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linux-stable/net/rxrpc/sendmsg.c

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rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/* AF_RXRPC sendmsg() implementation.
*
* Copyright (C) 2007, 2016 Red Hat, Inc. All Rights Reserved.
* Written by David Howells (dhowells@redhat.com)
*
* This program is free software; you can redistribute it and/or
* modify it under the terms of the GNU General Public Licence
* as published by the Free Software Foundation; either version
* 2 of the Licence, or (at your option) any later version.
*/
#define pr_fmt(fmt) KBUILD_MODNAME ": " fmt
#include <linux/net.h>
#include <linux/gfp.h>
#include <linux/skbuff.h>
#include <linux/export.h>
sched/headers: Prepare to move signal wakeup & sigpending methods from <linux/sched.h> into <linux/sched/signal.h> Fix up affected files that include this signal functionality via sched.h. Acked-by: Linus Torvalds <torvalds@linux-foundation.org> Cc: Mike Galbraith <efault@gmx.de> Cc: Peter Zijlstra <peterz@infradead.org> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: linux-kernel@vger.kernel.org Signed-off-by: Ingo Molnar <mingo@kernel.org>
2017-02-02 18:15:33 +00:00
#include <linux/sched/signal.h>
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
#include <net/sock.h>
#include <net/af_rxrpc.h>
#include "ar-internal.h"
rxrpc: Use MSG_WAITALL to tell sendmsg() to temporarily ignore signals Make AF_RXRPC accept MSG_WAITALL as a flag to sendmsg() to tell it to ignore signals whilst loading up the message queue, provided progress is being made in emptying the queue at the other side. Progress is defined as the base of the transmit window having being advanced within 2 RTT periods. If the period is exceeded with no progress, sendmsg() will return anyway, indicating how much data has been copied, if any. Once the supplied buffer is entirely decanted, the sendmsg() will return. Signed-off-by: David Howells <dhowells@redhat.com>
2017-10-18 10:07:31 +00:00
/*
* Wait for space to appear in the Tx queue or a signal to occur.
*/
static int rxrpc_wait_for_tx_window_intr(struct rxrpc_sock *rx,
struct rxrpc_call *call,
long *timeo)
{
for (;;) {
set_current_state(TASK_INTERRUPTIBLE);
if (call->tx_top - call->tx_hard_ack <
min_t(unsigned int, call->tx_winsize,
call->cong_cwnd + call->cong_extra))
return 0;
if (call->state >= RXRPC_CALL_COMPLETE)
return call->error;
if (signal_pending(current))
return sock_intr_errno(*timeo);
trace_rxrpc_transmit(call, rxrpc_transmit_wait);
mutex_unlock(&call->user_mutex);
*timeo = schedule_timeout(*timeo);
if (mutex_lock_interruptible(&call->user_mutex) < 0)
return sock_intr_errno(*timeo);
}
}
/*
* Wait for space to appear in the Tx queue uninterruptibly, but with
* a timeout of 2*RTT if no progress was made and a signal occurred.
*/
static int rxrpc_wait_for_tx_window_nonintr(struct rxrpc_sock *rx,
struct rxrpc_call *call)
{
rxrpc_seq_t tx_start, tx_win;
signed long rtt2, timeout;
u64 rtt;
rtt = READ_ONCE(call->peer->rtt);
rtt2 = nsecs_to_jiffies64(rtt) * 2;
if (rtt2 < 1)
rtt2 = 1;
timeout = rtt2;
tx_start = READ_ONCE(call->tx_hard_ack);
for (;;) {
set_current_state(TASK_UNINTERRUPTIBLE);
tx_win = READ_ONCE(call->tx_hard_ack);
if (call->tx_top - tx_win <
min_t(unsigned int, call->tx_winsize,
call->cong_cwnd + call->cong_extra))
return 0;
if (call->state >= RXRPC_CALL_COMPLETE)
return call->error;
if (timeout == 0 &&
tx_win == tx_start && signal_pending(current))
return -EINTR;
if (tx_win != tx_start) {
timeout = rtt2;
tx_start = tx_win;
}
trace_rxrpc_transmit(call, rxrpc_transmit_wait);
timeout = schedule_timeout(timeout);
}
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/*
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
* wait for space to appear in the transmit/ACK window
* - caller holds the socket locked
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
*/
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
static int rxrpc_wait_for_tx_window(struct rxrpc_sock *rx,
struct rxrpc_call *call,
rxrpc: Use MSG_WAITALL to tell sendmsg() to temporarily ignore signals Make AF_RXRPC accept MSG_WAITALL as a flag to sendmsg() to tell it to ignore signals whilst loading up the message queue, provided progress is being made in emptying the queue at the other side. Progress is defined as the base of the transmit window having being advanced within 2 RTT periods. If the period is exceeded with no progress, sendmsg() will return anyway, indicating how much data has been copied, if any. Once the supplied buffer is entirely decanted, the sendmsg() will return. Signed-off-by: David Howells <dhowells@redhat.com>
2017-10-18 10:07:31 +00:00
long *timeo,
bool waitall)
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
{
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
DECLARE_WAITQUEUE(myself, current);
int ret;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
_enter(",{%u,%u,%u}",
call->tx_hard_ack, call->tx_top, call->tx_winsize);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
add_wait_queue(&call->waitq, &myself);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Use MSG_WAITALL to tell sendmsg() to temporarily ignore signals Make AF_RXRPC accept MSG_WAITALL as a flag to sendmsg() to tell it to ignore signals whilst loading up the message queue, provided progress is being made in emptying the queue at the other side. Progress is defined as the base of the transmit window having being advanced within 2 RTT periods. If the period is exceeded with no progress, sendmsg() will return anyway, indicating how much data has been copied, if any. Once the supplied buffer is entirely decanted, the sendmsg() will return. Signed-off-by: David Howells <dhowells@redhat.com>
2017-10-18 10:07:31 +00:00
if (waitall)
ret = rxrpc_wait_for_tx_window_nonintr(rx, call);
else
ret = rxrpc_wait_for_tx_window_intr(rx, call, timeo);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
remove_wait_queue(&call->waitq, &myself);
set_current_state(TASK_RUNNING);
_leave(" = %d", ret);
return ret;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
/*
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
* Schedule an instant Tx resend.
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
*/
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
static inline void rxrpc_instant_resend(struct rxrpc_call *call, int ix)
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
{
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
spin_lock_bh(&call->lock);
if (call->state < RXRPC_CALL_COMPLETE) {
rxrpc: Fix Tx ring annotation after initial Tx failure rxrpc calls have a ring of packets that are awaiting ACK or retransmission and a parallel ring of annotations that tracks the state of those packets. If the initial transmission of a packet on the underlying UDP socket fails then the packet annotation is marked for resend - but the setting of this mark accidentally erases the last-packet mark also stored in the same annotation slot. If this happens, a call won't switch out of the Tx phase when all the packets have been transmitted. Fix this by retaining the last-packet mark and only altering the packet state. Fixes: 248f219cb8bc ("rxrpc: Rewrite the data and ack handling code") Signed-off-by: David Howells <dhowells@redhat.com>
2018-03-30 20:04:43 +00:00
call->rxtx_annotations[ix] =
(call->rxtx_annotations[ix] & RXRPC_TX_ANNO_LAST) |
RXRPC_TX_ANNO_RETRANS;
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
if (!test_and_set_bit(RXRPC_CALL_EV_RESEND, &call->events))
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc_queue_call(call);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
spin_unlock_bh(&call->lock);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
/*
* Notify the owner of the call that the transmit phase is ended and the last
* packet has been queued.
*/
static void rxrpc_notify_end_tx(struct rxrpc_sock *rx, struct rxrpc_call *call,
rxrpc_notify_end_tx_t notify_end_tx)
{
if (notify_end_tx)
notify_end_tx(&rx->sk, call, call->user_call_ID);
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/*
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
* Queue a DATA packet for transmission, set the resend timeout and send the
* packet immediately
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
*/
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
static void rxrpc_queue_packet(struct rxrpc_sock *rx, struct rxrpc_call *call,
struct sk_buff *skb, bool last,
rxrpc_notify_end_tx_t notify_end_tx)
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
{
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
struct rxrpc_skb_priv *sp = rxrpc_skb(skb);
rxrpc: Fix call timeouts Fix the rxrpc call expiration timeouts and make them settable from userspace. By analogy with other rx implementations, there should be three timeouts: (1) "Normal timeout" This is set for all calls and is triggered if we haven't received any packets from the peer in a while. It is measured from the last time we received any packet on that call. This is not reset by any connection packets (such as CHALLENGE/RESPONSE packets). If a service operation takes a long time, the server should generate PING ACKs at a duration that's substantially less than the normal timeout so is to keep both sides alive. This is set at 1/6 of normal timeout. (2) "Idle timeout" This is set only for a service call and is triggered if we stop receiving the DATA packets that comprise the request data. It is measured from the last time we received a DATA packet. (3) "Hard timeout" This can be set for a call and specified the maximum lifetime of that call. It should not be specified by default. Some operations (such as volume transfer) take a long time. Allow userspace to set/change the timeouts on a call with sendmsg, using a control message: RXRPC_SET_CALL_TIMEOUTS The data to the message is a number of 32-bit words, not all of which need be given: u32 hard_timeout; /* sec from first packet */ u32 idle_timeout; /* msec from packet Rx */ u32 normal_timeout; /* msec from data Rx */ This can be set in combination with any other sendmsg() that affects a call. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
unsigned long now;
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
rxrpc_seq_t seq = sp->hdr.seq;
int ret, ix;
rxrpc: Pass the last Tx packet marker in the annotation buffer When the last packet of data to be transmitted on a call is queued, tx_top is set and then the RXRPC_CALL_TX_LAST flag is set. Unfortunately, this leaves a race in the ACK processing side of things because the flag affects the interpretation of tx_top and also allows us to start receiving reply data before we've finished transmitting. To fix this, make the following changes: (1) rxrpc_queue_packet() now sets a marker in the annotation buffer instead of setting the RXRPC_CALL_TX_LAST flag. (2) rxrpc_rotate_tx_window() detects the marker and sets the flag in the same context as the routines that use it. (3) rxrpc_end_tx_phase() is simplified to just shift the call state. The Tx window must have been rotated before calling to discard the last packet. (4) rxrpc_receiving_reply() is added to handle the arrival of the first DATA packet of a reply to a client call (which is an implicit ACK of the Tx phase). (5) The last part of rxrpc_input_ack() is reordered to perform Tx rotation, then soft-ACK application and then to end the phase if we've rotated the last packet. In the event of a terminal ACK, the soft-ACK application will be skipped as nAcks should be 0. (6) rxrpc_input_ackall() now has to rotate as well as ending the phase. In addition: (7) Alter the transmit tracepoint to log the rotation of the last packet. (8) Remove the no-longer relevant queue_reqack tracepoint note. The ACK-REQUESTED packet header flag is now set as needed when we actually transmit the packet and may vary by retransmission. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-23 11:39:22 +00:00
u8 annotation = RXRPC_TX_ANNO_UNACK;
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
_net("queue skb %p [%d]", skb, seq);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
ASSERTCMP(seq, ==, call->tx_top + 1);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Allow failed client calls to be retried Allow a client call that failed on network error to be retried, provided that the Tx queue still holds DATA packet 1. This allows an operation to be submitted to another server or another address for the same server without having to repackage and re-encrypt the data so far processed. Two new functions are provided: (1) rxrpc_kernel_check_call() - This is used to find out the completion state of a call to guess whether it can be retried and whether it should be retried. (2) rxrpc_kernel_retry_call() - Disconnect the call from its current connection, reset the state and submit it as a new client call to a new address. The new address need not match the previous address. A call may be retried even if all the data hasn't been loaded into it yet; a partially constructed will be retained at the same point it was at when an error condition was detected. msg_data_left() can be used to find out how much data was packaged before the error occurred. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:19:01 +00:00
if (last) {
rxrpc: Pass the last Tx packet marker in the annotation buffer When the last packet of data to be transmitted on a call is queued, tx_top is set and then the RXRPC_CALL_TX_LAST flag is set. Unfortunately, this leaves a race in the ACK processing side of things because the flag affects the interpretation of tx_top and also allows us to start receiving reply data before we've finished transmitting. To fix this, make the following changes: (1) rxrpc_queue_packet() now sets a marker in the annotation buffer instead of setting the RXRPC_CALL_TX_LAST flag. (2) rxrpc_rotate_tx_window() detects the marker and sets the flag in the same context as the routines that use it. (3) rxrpc_end_tx_phase() is simplified to just shift the call state. The Tx window must have been rotated before calling to discard the last packet. (4) rxrpc_receiving_reply() is added to handle the arrival of the first DATA packet of a reply to a client call (which is an implicit ACK of the Tx phase). (5) The last part of rxrpc_input_ack() is reordered to perform Tx rotation, then soft-ACK application and then to end the phase if we've rotated the last packet. In the event of a terminal ACK, the soft-ACK application will be skipped as nAcks should be 0. (6) rxrpc_input_ackall() now has to rotate as well as ending the phase. In addition: (7) Alter the transmit tracepoint to log the rotation of the last packet. (8) Remove the no-longer relevant queue_reqack tracepoint note. The ACK-REQUESTED packet header flag is now set as needed when we actually transmit the packet and may vary by retransmission. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-23 11:39:22 +00:00
annotation |= RXRPC_TX_ANNO_LAST;
rxrpc: Allow failed client calls to be retried Allow a client call that failed on network error to be retried, provided that the Tx queue still holds DATA packet 1. This allows an operation to be submitted to another server or another address for the same server without having to repackage and re-encrypt the data so far processed. Two new functions are provided: (1) rxrpc_kernel_check_call() - This is used to find out the completion state of a call to guess whether it can be retried and whether it should be retried. (2) rxrpc_kernel_retry_call() - Disconnect the call from its current connection, reset the state and submit it as a new client call to a new address. The new address need not match the previous address. A call may be retried even if all the data hasn't been loaded into it yet; a partially constructed will be retained at the same point it was at when an error condition was detected. msg_data_left() can be used to find out how much data was packaged before the error occurred. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:19:01 +00:00
set_bit(RXRPC_CALL_TX_LASTQ, &call->flags);
}
rxrpc: Pass the last Tx packet marker in the annotation buffer When the last packet of data to be transmitted on a call is queued, tx_top is set and then the RXRPC_CALL_TX_LAST flag is set. Unfortunately, this leaves a race in the ACK processing side of things because the flag affects the interpretation of tx_top and also allows us to start receiving reply data before we've finished transmitting. To fix this, make the following changes: (1) rxrpc_queue_packet() now sets a marker in the annotation buffer instead of setting the RXRPC_CALL_TX_LAST flag. (2) rxrpc_rotate_tx_window() detects the marker and sets the flag in the same context as the routines that use it. (3) rxrpc_end_tx_phase() is simplified to just shift the call state. The Tx window must have been rotated before calling to discard the last packet. (4) rxrpc_receiving_reply() is added to handle the arrival of the first DATA packet of a reply to a client call (which is an implicit ACK of the Tx phase). (5) The last part of rxrpc_input_ack() is reordered to perform Tx rotation, then soft-ACK application and then to end the phase if we've rotated the last packet. In the event of a terminal ACK, the soft-ACK application will be skipped as nAcks should be 0. (6) rxrpc_input_ackall() now has to rotate as well as ending the phase. In addition: (7) Alter the transmit tracepoint to log the rotation of the last packet. (8) Remove the no-longer relevant queue_reqack tracepoint note. The ACK-REQUESTED packet header flag is now set as needed when we actually transmit the packet and may vary by retransmission. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-23 11:39:22 +00:00
rxrpc: Preset timestamp on Tx sk_buffs Set the timestamp on sk_buffs holding packets to be transmitted before queueing them because the moment the packet is on the queue it can be seen by the retransmission algorithm - which may see a completely random timestamp. If the retransmission algorithm sees such a timestamp, it may retransmit the packet and, in future, tell the congestion management algorithm that the retransmit timer expired. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-23 12:17:33 +00:00
/* We have to set the timestamp before queueing as the retransmit
* algorithm can see the packet as soon as we queue it.
*/
skb->tstamp = ktime_get_real();
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
ix = seq & RXRPC_RXTX_BUFF_MASK;
rxrpc: Improve skb tracing Improve sk_buff tracing within AF_RXRPC by the following means: (1) Use an enum to note the event type rather than plain integers and use an array of event names rather than a big multi ?: list. (2) Distinguish Rx from Tx packets and account them separately. This requires the call phase to be tracked so that we know what we might find in rxtx_buffer[]. (3) Add a parameter to rxrpc_{new,see,get,free}_skb() to indicate the event type. (4) A pair of 'rotate' events are added to indicate packets that are about to be rotated out of the Rx and Tx windows. (5) A pair of 'lost' events are added, along with rxrpc_lose_skb() for packet loss injection recording. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-17 09:49:14 +00:00
rxrpc_get_skb(skb, rxrpc_skb_tx_got);
rxrpc: Pass the last Tx packet marker in the annotation buffer When the last packet of data to be transmitted on a call is queued, tx_top is set and then the RXRPC_CALL_TX_LAST flag is set. Unfortunately, this leaves a race in the ACK processing side of things because the flag affects the interpretation of tx_top and also allows us to start receiving reply data before we've finished transmitting. To fix this, make the following changes: (1) rxrpc_queue_packet() now sets a marker in the annotation buffer instead of setting the RXRPC_CALL_TX_LAST flag. (2) rxrpc_rotate_tx_window() detects the marker and sets the flag in the same context as the routines that use it. (3) rxrpc_end_tx_phase() is simplified to just shift the call state. The Tx window must have been rotated before calling to discard the last packet. (4) rxrpc_receiving_reply() is added to handle the arrival of the first DATA packet of a reply to a client call (which is an implicit ACK of the Tx phase). (5) The last part of rxrpc_input_ack() is reordered to perform Tx rotation, then soft-ACK application and then to end the phase if we've rotated the last packet. In the event of a terminal ACK, the soft-ACK application will be skipped as nAcks should be 0. (6) rxrpc_input_ackall() now has to rotate as well as ending the phase. In addition: (7) Alter the transmit tracepoint to log the rotation of the last packet. (8) Remove the no-longer relevant queue_reqack tracepoint note. The ACK-REQUESTED packet header flag is now set as needed when we actually transmit the packet and may vary by retransmission. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-23 11:39:22 +00:00
call->rxtx_annotations[ix] = annotation;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
smp_wmb();
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
call->rxtx_buffer[ix] = skb;
call->tx_top = seq;
rxrpc: Pass the last Tx packet marker in the annotation buffer When the last packet of data to be transmitted on a call is queued, tx_top is set and then the RXRPC_CALL_TX_LAST flag is set. Unfortunately, this leaves a race in the ACK processing side of things because the flag affects the interpretation of tx_top and also allows us to start receiving reply data before we've finished transmitting. To fix this, make the following changes: (1) rxrpc_queue_packet() now sets a marker in the annotation buffer instead of setting the RXRPC_CALL_TX_LAST flag. (2) rxrpc_rotate_tx_window() detects the marker and sets the flag in the same context as the routines that use it. (3) rxrpc_end_tx_phase() is simplified to just shift the call state. The Tx window must have been rotated before calling to discard the last packet. (4) rxrpc_receiving_reply() is added to handle the arrival of the first DATA packet of a reply to a client call (which is an implicit ACK of the Tx phase). (5) The last part of rxrpc_input_ack() is reordered to perform Tx rotation, then soft-ACK application and then to end the phase if we've rotated the last packet. In the event of a terminal ACK, the soft-ACK application will be skipped as nAcks should be 0. (6) rxrpc_input_ackall() now has to rotate as well as ending the phase. In addition: (7) Alter the transmit tracepoint to log the rotation of the last packet. (8) Remove the no-longer relevant queue_reqack tracepoint note. The ACK-REQUESTED packet header flag is now set as needed when we actually transmit the packet and may vary by retransmission. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-23 11:39:22 +00:00
if (last)
rxrpc: Add a tracepoint to follow the life of a packet in the Tx buffer Add a tracepoint to follow the insertion of a packet into the transmit buffer, its transmission and its rotation out of the buffer. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-17 09:49:13 +00:00
trace_rxrpc_transmit(call, rxrpc_transmit_queue_last);
rxrpc: Pass the last Tx packet marker in the annotation buffer When the last packet of data to be transmitted on a call is queued, tx_top is set and then the RXRPC_CALL_TX_LAST flag is set. Unfortunately, this leaves a race in the ACK processing side of things because the flag affects the interpretation of tx_top and also allows us to start receiving reply data before we've finished transmitting. To fix this, make the following changes: (1) rxrpc_queue_packet() now sets a marker in the annotation buffer instead of setting the RXRPC_CALL_TX_LAST flag. (2) rxrpc_rotate_tx_window() detects the marker and sets the flag in the same context as the routines that use it. (3) rxrpc_end_tx_phase() is simplified to just shift the call state. The Tx window must have been rotated before calling to discard the last packet. (4) rxrpc_receiving_reply() is added to handle the arrival of the first DATA packet of a reply to a client call (which is an implicit ACK of the Tx phase). (5) The last part of rxrpc_input_ack() is reordered to perform Tx rotation, then soft-ACK application and then to end the phase if we've rotated the last packet. In the event of a terminal ACK, the soft-ACK application will be skipped as nAcks should be 0. (6) rxrpc_input_ackall() now has to rotate as well as ending the phase. In addition: (7) Alter the transmit tracepoint to log the rotation of the last packet. (8) Remove the no-longer relevant queue_reqack tracepoint note. The ACK-REQUESTED packet header flag is now set as needed when we actually transmit the packet and may vary by retransmission. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-23 11:39:22 +00:00
else
rxrpc: Add a tracepoint to follow the life of a packet in the Tx buffer Add a tracepoint to follow the insertion of a packet into the transmit buffer, its transmission and its rotation out of the buffer. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-17 09:49:13 +00:00
trace_rxrpc_transmit(call, rxrpc_transmit_queue);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (last || call->state == RXRPC_CALL_SERVER_ACK_REQUEST) {
_debug("________awaiting reply/ACK__________");
write_lock_bh(&call->state_lock);
switch (call->state) {
case RXRPC_CALL_CLIENT_SEND_REQUEST:
call->state = RXRPC_CALL_CLIENT_AWAIT_REPLY;
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
rxrpc_notify_end_tx(rx, call, notify_end_tx);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
break;
case RXRPC_CALL_SERVER_ACK_REQUEST:
call->state = RXRPC_CALL_SERVER_SEND_REPLY;
rxrpc: Fix call timeouts Fix the rxrpc call expiration timeouts and make them settable from userspace. By analogy with other rx implementations, there should be three timeouts: (1) "Normal timeout" This is set for all calls and is triggered if we haven't received any packets from the peer in a while. It is measured from the last time we received any packet on that call. This is not reset by any connection packets (such as CHALLENGE/RESPONSE packets). If a service operation takes a long time, the server should generate PING ACKs at a duration that's substantially less than the normal timeout so is to keep both sides alive. This is set at 1/6 of normal timeout. (2) "Idle timeout" This is set only for a service call and is triggered if we stop receiving the DATA packets that comprise the request data. It is measured from the last time we received a DATA packet. (3) "Hard timeout" This can be set for a call and specified the maximum lifetime of that call. It should not be specified by default. Some operations (such as volume transfer) take a long time. Allow userspace to set/change the timeouts on a call with sendmsg, using a control message: RXRPC_SET_CALL_TIMEOUTS The data to the message is a number of 32-bit words, not all of which need be given: u32 hard_timeout; /* sec from first packet */ u32 idle_timeout; /* msec from packet Rx */ u32 normal_timeout; /* msec from data Rx */ This can be set in combination with any other sendmsg() that affects a call. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
now = jiffies;
WRITE_ONCE(call->ack_at, now + MAX_JIFFY_OFFSET);
rxrpc: Need to produce an ACK for service op if op takes a long time We need to generate a DELAY ACK from the service end of an operation if we start doing the actual operation work and it takes longer than expected. This will hard-ACK the request data and allow the client to release its resources. To make this work: (1) We have to set the ack timer and propose an ACK when the call moves to the RXRPC_CALL_SERVER_ACK_REQUEST and clear the pending ACK and cancel the timer when we start transmitting the reply (the first DATA packet of the reply implicitly ACKs the request phase). (2) It must be possible to set the timer when the caller is holding call->state_lock, so split the lock-getting part of the timer function out. (3) Add trace notes for the ACK we're requesting and the timer we clear. Signed-off-by: David Howells <dhowells@redhat.com>
2016-10-06 07:11:50 +00:00
if (call->ackr_reason == RXRPC_ACK_DELAY)
call->ackr_reason = 0;
rxrpc: Fix call timeouts Fix the rxrpc call expiration timeouts and make them settable from userspace. By analogy with other rx implementations, there should be three timeouts: (1) "Normal timeout" This is set for all calls and is triggered if we haven't received any packets from the peer in a while. It is measured from the last time we received any packet on that call. This is not reset by any connection packets (such as CHALLENGE/RESPONSE packets). If a service operation takes a long time, the server should generate PING ACKs at a duration that's substantially less than the normal timeout so is to keep both sides alive. This is set at 1/6 of normal timeout. (2) "Idle timeout" This is set only for a service call and is triggered if we stop receiving the DATA packets that comprise the request data. It is measured from the last time we received a DATA packet. (3) "Hard timeout" This can be set for a call and specified the maximum lifetime of that call. It should not be specified by default. Some operations (such as volume transfer) take a long time. Allow userspace to set/change the timeouts on a call with sendmsg, using a control message: RXRPC_SET_CALL_TIMEOUTS The data to the message is a number of 32-bit words, not all of which need be given: u32 hard_timeout; /* sec from first packet */ u32 idle_timeout; /* msec from packet Rx */ u32 normal_timeout; /* msec from data Rx */ This can be set in combination with any other sendmsg() that affects a call. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
trace_rxrpc_timer(call, rxrpc_timer_init_for_send_reply, now);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (!last)
break;
net: rxrpc: mark expected switch fall-throughs In preparation to enabling -Wimplicit-fallthrough, mark switch cases where we are expecting to fall through. Signed-off-by: Gustavo A. R. Silva <garsilva@embeddedor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-10-19 21:54:48 +00:00
/* Fall through */
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
case RXRPC_CALL_SERVER_SEND_REPLY:
call->state = RXRPC_CALL_SERVER_AWAIT_ACK;
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
rxrpc_notify_end_tx(rx, call, notify_end_tx);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
break;
default:
break;
}
write_unlock_bh(&call->state_lock);
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
if (seq == 1 && rxrpc_is_client_call(call))
rxrpc_expose_client_call(call);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Make Tx loss-injection go through normal return and adjust tracing In rxrpc_send_data_packet() make the loss-injection path return through the same code as the transmission path so that the RTT determination is initiated and any future timer shuffling will be done, despite the packet having been binned. Whilst we're at it: (1) Add to the tx_data tracepoint an indication of whether or not we're retransmitting a data packet. (2) When we're deciding whether or not to request an ACK, rather than checking if we're in fast-retransmit mode check instead if we're retransmitting. (3) Don't invoke the lose_skb tracepoint when losing a Tx packet as we're not altering the sk_buff refcount nor are we just seeing it after getting it off the Tx list. (4) The rxrpc_skb_tx_lost note is then no longer used so remove it. (5) rxrpc_lose_skb() no longer needs to deal with rxrpc_skb_tx_lost. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-29 21:37:15 +00:00
ret = rxrpc_send_data_packet(call, skb, false);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (ret < 0) {
_debug("need instant resend %d", ret);
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
rxrpc_instant_resend(call, ix);
rxrpc: Need to start the resend timer on initial transmission When a DATA packet has its initial transmission, we may need to start or adjust the resend timer. Without this we end up relying on being sent a NACK to initiate the resend. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-23 11:39:23 +00:00
} else {
rxrpc: Fix call timeouts Fix the rxrpc call expiration timeouts and make them settable from userspace. By analogy with other rx implementations, there should be three timeouts: (1) "Normal timeout" This is set for all calls and is triggered if we haven't received any packets from the peer in a while. It is measured from the last time we received any packet on that call. This is not reset by any connection packets (such as CHALLENGE/RESPONSE packets). If a service operation takes a long time, the server should generate PING ACKs at a duration that's substantially less than the normal timeout so is to keep both sides alive. This is set at 1/6 of normal timeout. (2) "Idle timeout" This is set only for a service call and is triggered if we stop receiving the DATA packets that comprise the request data. It is measured from the last time we received a DATA packet. (3) "Hard timeout" This can be set for a call and specified the maximum lifetime of that call. It should not be specified by default. Some operations (such as volume transfer) take a long time. Allow userspace to set/change the timeouts on a call with sendmsg, using a control message: RXRPC_SET_CALL_TIMEOUTS The data to the message is a number of 32-bit words, not all of which need be given: u32 hard_timeout; /* sec from first packet */ u32 idle_timeout; /* msec from packet Rx */ u32 normal_timeout; /* msec from data Rx */ This can be set in combination with any other sendmsg() that affects a call. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
unsigned long now = jiffies, resend_at;
rxrpc: Need to start the resend timer on initial transmission When a DATA packet has its initial transmission, we may need to start or adjust the resend timer. Without this we end up relying on being sent a NACK to initiate the resend. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-23 11:39:23 +00:00
rxrpc: Express protocol timeouts in terms of RTT Express protocol timeouts for data retransmission and deferred ack generation in terms on RTT rather than specified timeouts once we have sufficient RTT samples. For the moment, this requires just one RTT sample to be able to use this for ack deferral and two for data retransmission. The data retransmission timeout is set at RTT*1.5 and the ACK deferral timeout is set at RTT. Note that the calculated timeout is limited to a minimum of 4ns to make sure it doesn't happen too quickly. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
if (call->peer->rtt_usage > 1)
resend_at = nsecs_to_jiffies(call->peer->rtt * 3 / 2);
else
resend_at = rxrpc_resend_timeout;
if (resend_at < 1)
resend_at = 1;
rxrpc: Fix variable overwrite Values assigned to both variable resend_at and ack_at are overwritten before they can be used. The correct fix here is to add 'now' to the previously computed value in resend_at and ack_at. Addresses-Coverity-ID: 1462262 Addresses-Coverity-ID: 1462263 Addresses-Coverity-ID: 1462264 Fixes: beb8e5e4f38c ("rxrpc: Express protocol timeouts in terms of RTT") Link: https://marc.info/?i=17004.1511808959%40warthog.procyon.org.uk Signed-off-by: Gustavo A. R. Silva <garsilva@embeddedor.com> Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-28 17:28:52 +00:00
resend_at += now;
rxrpc: Fix call timeouts Fix the rxrpc call expiration timeouts and make them settable from userspace. By analogy with other rx implementations, there should be three timeouts: (1) "Normal timeout" This is set for all calls and is triggered if we haven't received any packets from the peer in a while. It is measured from the last time we received any packet on that call. This is not reset by any connection packets (such as CHALLENGE/RESPONSE packets). If a service operation takes a long time, the server should generate PING ACKs at a duration that's substantially less than the normal timeout so is to keep both sides alive. This is set at 1/6 of normal timeout. (2) "Idle timeout" This is set only for a service call and is triggered if we stop receiving the DATA packets that comprise the request data. It is measured from the last time we received a DATA packet. (3) "Hard timeout" This can be set for a call and specified the maximum lifetime of that call. It should not be specified by default. Some operations (such as volume transfer) take a long time. Allow userspace to set/change the timeouts on a call with sendmsg, using a control message: RXRPC_SET_CALL_TIMEOUTS The data to the message is a number of 32-bit words, not all of which need be given: u32 hard_timeout; /* sec from first packet */ u32 idle_timeout; /* msec from packet Rx */ u32 normal_timeout; /* msec from data Rx */ This can be set in combination with any other sendmsg() that affects a call. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
WRITE_ONCE(call->resend_at, resend_at);
rxrpc_reduce_call_timer(call, resend_at, now,
rxrpc_timer_set_for_send);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Improve skb tracing Improve sk_buff tracing within AF_RXRPC by the following means: (1) Use an enum to note the event type rather than plain integers and use an array of event names rather than a big multi ?: list. (2) Distinguish Rx from Tx packets and account them separately. This requires the call phase to be tracked so that we know what we might find in rxtx_buffer[]. (3) Add a parameter to rxrpc_{new,see,get,free}_skb() to indicate the event type. (4) A pair of 'rotate' events are added to indicate packets that are about to be rotated out of the Rx and Tx windows. (5) A pair of 'lost' events are added, along with rxrpc_lose_skb() for packet loss injection recording. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-17 09:49:14 +00:00
rxrpc_free_skb(skb, rxrpc_skb_tx_freed);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_leave("");
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/*
* send data through a socket
* - must be called in process context
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
* - The caller holds the call user access mutex, but not the socket lock.
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
*/
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
static int rxrpc_send_data(struct rxrpc_sock *rx,
struct rxrpc_call *call,
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
struct msghdr *msg, size_t len,
rxrpc_notify_end_tx_t notify_end_tx)
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
{
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
struct rxrpc_skb_priv *sp;
struct sk_buff *skb;
struct sock *sk = &rx->sk;
long timeo;
bool more;
int ret, copied;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
timeo = sock_sndtimeo(sk, msg->msg_flags & MSG_DONTWAIT);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/* this should be in poll */
sk_clear_bit(SOCKWQ_ASYNC_NOSPACE, sk);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (sk->sk_err || (sk->sk_shutdown & SEND_SHUTDOWN))
return -EPIPE;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
more = msg->msg_flags & MSG_MORE;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
if (call->tx_total_len != -1) {
if (len > call->tx_total_len)
return -EMSGSIZE;
if (!more && len != call->tx_total_len)
return -EMSGSIZE;
}
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
skb = call->tx_pending;
call->tx_pending = NULL;
rxrpc: Improve skb tracing Improve sk_buff tracing within AF_RXRPC by the following means: (1) Use an enum to note the event type rather than plain integers and use an array of event names rather than a big multi ?: list. (2) Distinguish Rx from Tx packets and account them separately. This requires the call phase to be tracked so that we know what we might find in rxtx_buffer[]. (3) Add a parameter to rxrpc_{new,see,get,free}_skb() to indicate the event type. (4) A pair of 'rotate' events are added to indicate packets that are about to be rotated out of the Rx and Tx windows. (5) A pair of 'lost' events are added, along with rxrpc_lose_skb() for packet loss injection recording. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-17 09:49:14 +00:00
rxrpc_see_skb(skb, rxrpc_skb_tx_seen);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
copied = 0;
do {
rxrpc: Expedite ping response transmission Expedite the transmission of a response to a PING ACK by sending it from sendmsg if one is pending. We're most likely to see a PING ACK during the client call Tx phase as the other side may use it to determine a number of parameters, such as the client's receive window size, the RTT and whether the client is doing slow start (similar to RFC5681). If we don't expedite it, it's left to the background processing thread to transmit. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-21 23:29:31 +00:00
/* Check to see if there's a ping ACK to reply to. */
if (call->ackr_reason == RXRPC_ACK_PING_RESPONSE)
rxrpc: Add a timeout for detecting lost ACKs/lost DATA Add an extra timeout that is set/updated when we send a DATA packet that has the request-ack flag set. This allows us to detect if we don't get an ACK in response to the latest flagged packet. The ACK packet is adjudged to have been lost if it doesn't turn up within 2*RTT of the transmission. If the timeout occurs, we schedule the sending of a PING ACK to find out the state of the other side. If a new DATA packet is ready to go sooner, we cancel the sending of the ping and set the request-ack flag on that instead. If we get back a PING-RESPONSE ACK that indicates a lower tx_top than what we had at the time of the ping transmission, we adjudge all the DATA packets sent between the response tx_top and the ping-time tx_top to have been lost and retransmit immediately. Rather than sending a PING ACK, we could just pick a DATA packet and speculatively retransmit that with request-ack set. It should result in either a REQUESTED ACK or a DUPLICATE ACK which we can then use in lieu the a PING-RESPONSE ACK mentioned above. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:42 +00:00
rxrpc_send_ack_packet(call, false, NULL);
rxrpc: Expedite ping response transmission Expedite the transmission of a response to a PING ACK by sending it from sendmsg if one is pending. We're most likely to see a PING ACK during the client call Tx phase as the other side may use it to determine a number of parameters, such as the client's receive window size, the RTT and whether the client is doing slow start (similar to RFC5681). If we don't expedite it, it's left to the background processing thread to transmit. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-21 23:29:31 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (!skb) {
size_t size, chunk, max, space;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_debug("alloc");
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
if (call->tx_top - call->tx_hard_ack >=
rxrpc: Implement slow-start Implement RxRPC slow-start, which is similar to RFC 5681 for TCP. A tracepoint is added to log the state of the congestion management algorithm and the decisions it makes. Notes: (1) Since we send fixed-size DATA packets (apart from the final packet in each phase), counters and calculations are in terms of packets rather than bytes. (2) The ACK packet carries the equivalent of TCP SACK. (3) The FLIGHT_SIZE calculation in RFC 5681 doesn't seem particularly suited to SACK of a small number of packets. It seems that, almost inevitably, by the time three 'duplicate' ACKs have been seen, we have narrowed the loss down to one or two missing packets, and the FLIGHT_SIZE calculation ends up as 2. (4) In rxrpc_resend(), if there was no data that apparently needed retransmission, we transmit a PING ACK to ask the peer to tell us what its Rx window state is. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-24 17:05:27 +00:00
min_t(unsigned int, call->tx_winsize,
call->cong_cwnd + call->cong_extra)) {
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
ret = -EAGAIN;
if (msg->msg_flags & MSG_DONTWAIT)
goto maybe_error;
ret = rxrpc_wait_for_tx_window(rx, call,
rxrpc: Use MSG_WAITALL to tell sendmsg() to temporarily ignore signals Make AF_RXRPC accept MSG_WAITALL as a flag to sendmsg() to tell it to ignore signals whilst loading up the message queue, provided progress is being made in emptying the queue at the other side. Progress is defined as the base of the transmit window having being advanced within 2 RTT periods. If the period is exceeded with no progress, sendmsg() will return anyway, indicating how much data has been copied, if any. Once the supplied buffer is entirely decanted, the sendmsg() will return. Signed-off-by: David Howells <dhowells@redhat.com>
2017-10-18 10:07:31 +00:00
&timeo,
msg->msg_flags & MSG_WAITALL);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (ret < 0)
goto maybe_error;
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Fix the basic transmit DATA packet content size at 1412 bytes Fix the basic transmit DATA packet content size at 1412 bytes so that they can be arbitrarily assembled into jumbo packets. In the future, I'm thinking of moving to keeping a jumbo packet header at the beginning of each packet in the Tx queue and creating the packet header on the spot when kernel_sendmsg() is invoked. That way, jumbo packets can be assembled on the spur of the moment for (re-)transmission. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-17 09:49:12 +00:00
max = RXRPC_JUMBO_DATALEN;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
max -= call->conn->security_size;
max &= ~(call->conn->size_align - 1UL);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
chunk = max;
if (chunk > msg_data_left(msg) && !more)
chunk = msg_data_left(msg);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
space = chunk + call->conn->size_align;
space &= ~(call->conn->size_align - 1UL);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Don't store the rxrpc header in the Tx queue sk_buffs Don't store the rxrpc protocol header in sk_buffs on the transmit queue, but rather generate it on the fly and pass it to kernel_sendmsg() as a separate iov. This reduces the amount of storage required. Note that the security header is still stored in the sk_buff as it may get encrypted along with the data (and doesn't change with each transmission). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-21 23:29:31 +00:00
size = space + call->conn->security_size;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_debug("SIZE: %zu/%zu/%zu", chunk, space, size);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/* create a buffer that we can retain until it's ACK'd */
skb = sock_alloc_send_skb(
sk, size, msg->msg_flags & MSG_DONTWAIT, &ret);
if (!skb)
goto maybe_error;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Improve skb tracing Improve sk_buff tracing within AF_RXRPC by the following means: (1) Use an enum to note the event type rather than plain integers and use an array of event names rather than a big multi ?: list. (2) Distinguish Rx from Tx packets and account them separately. This requires the call phase to be tracked so that we know what we might find in rxtx_buffer[]. (3) Add a parameter to rxrpc_{new,see,get,free}_skb() to indicate the event type. (4) A pair of 'rotate' events are added to indicate packets that are about to be rotated out of the Rx and Tx windows. (5) A pair of 'lost' events are added, along with rxrpc_lose_skb() for packet loss injection recording. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-17 09:49:14 +00:00
rxrpc_new_skb(skb, rxrpc_skb_tx_new);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_debug("ALLOC SEND %p", skb);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
ASSERTCMP(skb->mark, ==, 0);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Don't store the rxrpc header in the Tx queue sk_buffs Don't store the rxrpc protocol header in sk_buffs on the transmit queue, but rather generate it on the fly and pass it to kernel_sendmsg() as a separate iov. This reduces the amount of storage required. Note that the security header is still stored in the sk_buff as it may get encrypted along with the data (and doesn't change with each transmission). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-21 23:29:31 +00:00
_debug("HS: %u", call->conn->security_size);
skb_reserve(skb, call->conn->security_size);
skb->len += call->conn->security_size;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
sp = rxrpc_skb(skb);
sp->remain = chunk;
if (sp->remain > skb_tailroom(skb))
sp->remain = skb_tailroom(skb);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_net("skb: hr %d, tr %d, hl %d, rm %d",
skb_headroom(skb),
skb_tailroom(skb),
skb_headlen(skb),
sp->remain);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
skb->ip_summed = CHECKSUM_UNNECESSARY;
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_debug("append");
sp = rxrpc_skb(skb);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/* append next segment of data to the current buffer */
if (msg_data_left(msg) > 0) {
int copy = skb_tailroom(skb);
ASSERTCMP(copy, >, 0);
if (copy > msg_data_left(msg))
copy = msg_data_left(msg);
if (copy > sp->remain)
copy = sp->remain;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_debug("add");
ret = skb_add_data(skb, &msg->msg_iter, copy);
_debug("added");
if (ret < 0)
goto efault;
sp->remain -= copy;
skb->mark += copy;
copied += copy;
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
if (call->tx_total_len != -1)
call->tx_total_len -= copy;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/* add the packet to the send queue if it's now full */
if (sp->remain <= 0 ||
(msg_data_left(msg) == 0 && !more)) {
struct rxrpc_connection *conn = call->conn;
uint32_t seq;
size_t pad;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/* pad out if we're using security */
if (conn->security_ix) {
pad = conn->security_size + skb->mark;
pad = conn->size_align - pad;
pad &= conn->size_align - 1;
_debug("pad %zu", pad);
if (pad)
networking: convert many more places to skb_put_zero() There were many places that my previous spatch didn't find, as pointed out by yuan linyu in various patches. The following spatch found many more and also removes the now unnecessary casts: @@ identifier p, p2; expression len; expression skb; type t, t2; @@ ( -p = skb_put(skb, len); +p = skb_put_zero(skb, len); | -p = (t)skb_put(skb, len); +p = skb_put_zero(skb, len); ) ... when != p ( p2 = (t2)p; -memset(p2, 0, len); | -memset(p, 0, len); ) @@ type t, t2; identifier p, p2; expression skb; @@ t *p; ... ( -p = skb_put(skb, sizeof(t)); +p = skb_put_zero(skb, sizeof(t)); | -p = (t *)skb_put(skb, sizeof(t)); +p = skb_put_zero(skb, sizeof(t)); ) ... when != p ( p2 = (t2)p; -memset(p2, 0, sizeof(*p)); | -memset(p, 0, sizeof(*p)); ) @@ expression skb, len; @@ -memset(skb_put(skb, len), 0, len); +skb_put_zero(skb, len); Apply it to the tree (with one manual fixup to keep the comment in vxlan.c, which spatch removed.) Signed-off-by: Johannes Berg <johannes.berg@intel.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-06-16 12:29:19 +00:00
skb_put_zero(skb, pad);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
seq = call->tx_top + 1;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
sp->hdr.seq = seq;
sp->hdr._rsvd = 0;
rxrpc: Don't store the rxrpc header in the Tx queue sk_buffs Don't store the rxrpc protocol header in sk_buffs on the transmit queue, but rather generate it on the fly and pass it to kernel_sendmsg() as a separate iov. This reduces the amount of storage required. Note that the security header is still stored in the sk_buff as it may get encrypted along with the data (and doesn't change with each transmission). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-21 23:29:31 +00:00
sp->hdr.flags = conn->out_clientflag;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (msg_data_left(msg) == 0 && !more)
sp->hdr.flags |= RXRPC_LAST_PACKET;
rxrpc: Rewrite the data and ack handling code Rewrite the data and ack handling code such that: (1) Parsing of received ACK and ABORT packets and the distribution and the filing of DATA packets happens entirely within the data_ready context called from the UDP socket. This allows us to process and discard ACK and ABORT packets much more quickly (they're no longer stashed on a queue for a background thread to process). (2) We avoid calling skb_clone(), pskb_pull() and pskb_trim(). We instead keep track of the offset and length of the content of each packet in the sk_buff metadata. This means we don't do any allocation in the receive path. (3) Jumbo DATA packet parsing is now done in data_ready context. Rather than cloning the packet once for each subpacket and pulling/trimming it, we file the packet multiple times with an annotation for each indicating which subpacket is there. From that we can directly calculate the offset and length. (4) A call's receive queue can be accessed without taking locks (memory barriers do have to be used, though). (5) Incoming calls are set up from preallocated resources and immediately made live. They can than have packets queued upon them and ACKs generated. If insufficient resources exist, DATA packet #1 is given a BUSY reply and other DATA packets are discarded). (6) sk_buffs no longer take a ref on their parent call. To make this work, the following changes are made: (1) Each call's receive buffer is now a circular buffer of sk_buff pointers (rxtx_buffer) rather than a number of sk_buff_heads spread between the call and the socket. This permits each sk_buff to be in the buffer multiple times. The receive buffer is reused for the transmit buffer. (2) A circular buffer of annotations (rxtx_annotations) is kept parallel to the data buffer. Transmission phase annotations indicate whether a buffered packet has been ACK'd or not and whether it needs retransmission. Receive phase annotations indicate whether a slot holds a whole packet or a jumbo subpacket and, if the latter, which subpacket. They also note whether the packet has been decrypted in place. (3) DATA packet window tracking is much simplified. Each phase has just two numbers representing the window (rx_hard_ack/rx_top and tx_hard_ack/tx_top). The hard_ack number is the sequence number before base of the window, representing the last packet the other side says it has consumed. hard_ack starts from 0 and the first packet is sequence number 1. The top number is the sequence number of the highest-numbered packet residing in the buffer. Packets between hard_ack+1 and top are soft-ACK'd to indicate they've been received, but not yet consumed. Four macros, before(), before_eq(), after() and after_eq() are added to compare sequence numbers within the window. This allows for the top of the window to wrap when the hard-ack sequence number gets close to the limit. Two flags, RXRPC_CALL_RX_LAST and RXRPC_CALL_TX_LAST, are added also to indicate when rx_top and tx_top point at the packets with the LAST_PACKET bit set, indicating the end of the phase. (4) Calls are queued on the socket 'receive queue' rather than packets. This means that we don't need have to invent dummy packets to queue to indicate abnormal/terminal states and we don't have to keep metadata packets (such as ABORTs) around (5) The offset and length of a (sub)packet's content are now passed to the verify_packet security op. This is currently expected to decrypt the packet in place and validate it. However, there's now nowhere to store the revised offset and length of the actual data within the decrypted blob (there may be a header and padding to skip) because an sk_buff may represent multiple packets, so a locate_data security op is added to retrieve these details from the sk_buff content when needed. (6) recvmsg() now has to handle jumbo subpackets, where each subpacket is individually secured and needs to be individually decrypted. The code to do this is broken out into rxrpc_recvmsg_data() and shared with the kernel API. It now iterates over the call's receive buffer rather than walking the socket receive queue. Additional changes: (1) The timers are condensed to a single timer that is set for the soonest of three timeouts (delayed ACK generation, DATA retransmission and call lifespan). (2) Transmission of ACK and ABORT packets is effected immediately from process-context socket ops/kernel API calls that cause them instead of them being punted off to a background work item. The data_ready handler still has to defer to the background, though. (3) A shutdown op is added to the AF_RXRPC socket so that the AFS filesystem can shut down the socket and flush its own work items before closing the socket to deal with any in-progress service calls. Future additional changes that will need to be considered: (1) Make sure that a call doesn't hog the front of the queue by receiving data from the network as fast as userspace is consuming it to the exclusion of other calls. (2) Transmit delayed ACKs from within recvmsg() when we've consumed sufficiently more packets to avoid the background work item needing to run. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-08 10:10:12 +00:00
else if (call->tx_top - call->tx_hard_ack <
call->tx_winsize)
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
sp->hdr.flags |= RXRPC_MORE_PACKETS;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
ret = conn->security->secure_packet(
rxrpc: Don't store the rxrpc header in the Tx queue sk_buffs Don't store the rxrpc protocol header in sk_buffs on the transmit queue, but rather generate it on the fly and pass it to kernel_sendmsg() as a separate iov. This reduces the amount of storage required. Note that the security header is still stored in the sk_buff as it may get encrypted along with the data (and doesn't change with each transmission). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-21 23:29:31 +00:00
call, skb, skb->mark, skb->head);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (ret < 0)
goto out;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
rxrpc_queue_packet(rx, call, skb,
!msg_data_left(msg) && !more,
notify_end_tx);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
skb = NULL;
}
rxrpc: Allow failed client calls to be retried Allow a client call that failed on network error to be retried, provided that the Tx queue still holds DATA packet 1. This allows an operation to be submitted to another server or another address for the same server without having to repackage and re-encrypt the data so far processed. Two new functions are provided: (1) rxrpc_kernel_check_call() - This is used to find out the completion state of a call to guess whether it can be retried and whether it should be retried. (2) rxrpc_kernel_retry_call() - Disconnect the call from its current connection, reset the state and submit it as a new client call to a new address. The new address need not match the previous address. A call may be retried even if all the data hasn't been loaded into it yet; a partially constructed will be retained at the same point it was at when an error condition was detected. msg_data_left() can be used to find out how much data was packaged before the error occurred. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:19:01 +00:00
/* Check for the far side aborting the call or a network error
* occurring. If this happens, save any packet that was under
* construction so that in the case of a network error, the
* call can be retried or redirected.
*/
if (call->state == RXRPC_CALL_COMPLETE) {
ret = call->error;
goto out;
}
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
} while (msg_data_left(msg) > 0);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
success:
ret = copied;
out:
call->tx_pending = skb;
_leave(" = %d", ret);
return ret;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
maybe_error:
if (copied)
goto success;
goto out;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
efault:
ret = -EFAULT;
goto out;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
/*
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
* extract control messages from the sendmsg() control buffer
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
*/
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
static int rxrpc_sendmsg_cmsg(struct msghdr *msg, struct rxrpc_send_params *p)
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
{
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
struct cmsghdr *cmsg;
bool got_user_ID = false;
int len;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (msg->msg_controllen == 0)
return -EINVAL;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
for_each_cmsghdr(cmsg, msg) {
if (!CMSG_OK(msg, cmsg))
return -EINVAL;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
scm: remove use CMSG{_COMPAT}_ALIGN(sizeof(struct {compat_}cmsghdr)) sizeof(struct cmsghdr) and sizeof(struct compat_cmsghdr) already aligned. remove use CMSG_ALIGN(sizeof(struct cmsghdr)) and CMSG_COMPAT_ALIGN(sizeof(struct compat_cmsghdr)) keep code consistent. Signed-off-by: yuan linyu <Linyu.Yuan@alcatel-sbell.com.cn> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-01-03 12:42:17 +00:00
len = cmsg->cmsg_len - sizeof(struct cmsghdr);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_debug("CMSG %d, %d, %d",
cmsg->cmsg_level, cmsg->cmsg_type, len);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (cmsg->cmsg_level != SOL_RXRPC)
continue;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
switch (cmsg->cmsg_type) {
case RXRPC_USER_CALL_ID:
if (msg->msg_flags & MSG_CMSG_COMPAT) {
if (len != sizeof(u32))
return -EINVAL;
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
p->call.user_call_ID = *(u32 *)CMSG_DATA(cmsg);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
} else {
if (len != sizeof(unsigned long))
return -EINVAL;
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
p->call.user_call_ID = *(unsigned long *)
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
CMSG_DATA(cmsg);
}
got_user_ID = true;
break;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
case RXRPC_ABORT:
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
if (p->command != RXRPC_CMD_SEND_DATA)
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
return -EINVAL;
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
p->command = RXRPC_CMD_SEND_ABORT;
if (len != sizeof(p->abort_code))
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
return -EINVAL;
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
p->abort_code = *(unsigned int *)CMSG_DATA(cmsg);
if (p->abort_code == 0)
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
return -EINVAL;
break;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
case RXRPC_ACCEPT:
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
if (p->command != RXRPC_CMD_SEND_DATA)
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
return -EINVAL;
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
p->command = RXRPC_CMD_ACCEPT;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (len != 0)
return -EINVAL;
break;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
case RXRPC_EXCLUSIVE_CALL:
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
p->exclusive = true;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (len != 0)
return -EINVAL;
break;
rxrpc: Add service upgrade support for client connections Make it possible for a client to use AuriStor's service upgrade facility. The client does this by adding an RXRPC_UPGRADE_SERVICE control message to the first sendmsg() of a call. This takes no parameters. When recvmsg() starts returning data from the call, the service ID field in the returned msg_name will reflect the result of the upgrade attempt. If the upgrade was ignored, srx_service will match what was set in the sendmsg(); if the upgrade happened the srx_service will be altered to indicate the service the server upgraded to. Note that: (1) The choice of upgrade service is up to the server (2) Further client calls to the same server that would share a connection are blocked if an upgrade probe is in progress. (3) This should only be used to probe the service. Clients should then use the returned service ID in all subsequent communications with that server (and not set the upgrade). Note that the kernel will not retain this information should the connection expire from its cache. (4) If a server that supports upgrading is replaced by one that doesn't, whilst a connection is live, and if the replacement is running, say, OpenAFS 1.6.4 or older or an older IBM AFS, then the replacement server will not respond to packets sent to the upgraded connection. At this point, calls will time out and the server must be reprobed. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-05 13:30:49 +00:00
case RXRPC_UPGRADE_SERVICE:
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
p->upgrade = true;
rxrpc: Add service upgrade support for client connections Make it possible for a client to use AuriStor's service upgrade facility. The client does this by adding an RXRPC_UPGRADE_SERVICE control message to the first sendmsg() of a call. This takes no parameters. When recvmsg() starts returning data from the call, the service ID field in the returned msg_name will reflect the result of the upgrade attempt. If the upgrade was ignored, srx_service will match what was set in the sendmsg(); if the upgrade happened the srx_service will be altered to indicate the service the server upgraded to. Note that: (1) The choice of upgrade service is up to the server (2) Further client calls to the same server that would share a connection are blocked if an upgrade probe is in progress. (3) This should only be used to probe the service. Clients should then use the returned service ID in all subsequent communications with that server (and not set the upgrade). Note that the kernel will not retain this information should the connection expire from its cache. (4) If a server that supports upgrading is replaced by one that doesn't, whilst a connection is live, and if the replacement is running, say, OpenAFS 1.6.4 or older or an older IBM AFS, then the replacement server will not respond to packets sent to the upgraded connection. At this point, calls will time out and the server must be reprobed. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-05 13:30:49 +00:00
if (len != 0)
return -EINVAL;
break;
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
case RXRPC_TX_LENGTH:
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
if (p->call.tx_total_len != -1 || len != sizeof(__s64))
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
return -EINVAL;
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
p->call.tx_total_len = *(__s64 *)CMSG_DATA(cmsg);
if (p->call.tx_total_len < 0)
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
return -EINVAL;
break;
rxrpc: Fix call timeouts Fix the rxrpc call expiration timeouts and make them settable from userspace. By analogy with other rx implementations, there should be three timeouts: (1) "Normal timeout" This is set for all calls and is triggered if we haven't received any packets from the peer in a while. It is measured from the last time we received any packet on that call. This is not reset by any connection packets (such as CHALLENGE/RESPONSE packets). If a service operation takes a long time, the server should generate PING ACKs at a duration that's substantially less than the normal timeout so is to keep both sides alive. This is set at 1/6 of normal timeout. (2) "Idle timeout" This is set only for a service call and is triggered if we stop receiving the DATA packets that comprise the request data. It is measured from the last time we received a DATA packet. (3) "Hard timeout" This can be set for a call and specified the maximum lifetime of that call. It should not be specified by default. Some operations (such as volume transfer) take a long time. Allow userspace to set/change the timeouts on a call with sendmsg, using a control message: RXRPC_SET_CALL_TIMEOUTS The data to the message is a number of 32-bit words, not all of which need be given: u32 hard_timeout; /* sec from first packet */ u32 idle_timeout; /* msec from packet Rx */ u32 normal_timeout; /* msec from data Rx */ This can be set in combination with any other sendmsg() that affects a call. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
case RXRPC_SET_CALL_TIMEOUT:
if (len & 3 || len < 4 || len > 12)
return -EINVAL;
memcpy(&p->call.timeouts, CMSG_DATA(cmsg), len);
p->call.nr_timeouts = len / 4;
if (p->call.timeouts.hard > INT_MAX / HZ)
return -ERANGE;
if (p->call.nr_timeouts >= 2 && p->call.timeouts.idle > 60 * 60 * 1000)
return -ERANGE;
if (p->call.nr_timeouts >= 3 && p->call.timeouts.normal > 60 * 60 * 1000)
return -ERANGE;
break;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
default:
return -EINVAL;
}
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (!got_user_ID)
return -EINVAL;
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
if (p->call.tx_total_len != -1 && p->command != RXRPC_CMD_SEND_DATA)
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
return -EINVAL;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_leave(" = 0");
return 0;
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/*
* Create a new client call for sendmsg().
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
* - Called with the socket lock held, which it must release.
* - If it returns a call, the call's lock will need releasing by the caller.
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
*/
static struct rxrpc_call *
rxrpc_new_client_call_for_sendmsg(struct rxrpc_sock *rx, struct msghdr *msg,
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
struct rxrpc_send_params *p)
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
__releases(&rx->sk.sk_lock.slock)
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
{
struct rxrpc_conn_parameters cp;
struct rxrpc_call *call;
struct key *key;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
DECLARE_SOCKADDR(struct sockaddr_rxrpc *, srx, msg->msg_name);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_enter("");
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
if (!msg->msg_name) {
release_sock(&rx->sk);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
return ERR_PTR(-EDESTADDRREQ);
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
key = rx->key;
if (key && !rx->key->payload.data[0])
key = NULL;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
memset(&cp, 0, sizeof(cp));
cp.local = rx->local;
cp.key = rx->key;
cp.security_level = rx->min_sec_level;
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
cp.exclusive = rx->exclusive | p->exclusive;
cp.upgrade = p->upgrade;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
cp.service_id = srx->srx_service;
rxrpc, afs: Use debug_ids rather than pointers in traces In rxrpc and afs, use the debug_ids that are monotonically allocated to various objects as they're allocated rather than pointers as kernel pointers are now hashed making them less useful. Further, the debug ids aren't reused anywhere nearly as quickly. In addition, allow kernel services that use rxrpc, such as afs, to take numbers from the rxrpc counter, assign them to their own call struct and pass them in to rxrpc for both client and service calls so that the trace lines for each will have the same ID tag. Signed-off-by: David Howells <dhowells@redhat.com>
2018-03-27 22:03:00 +00:00
call = rxrpc_new_client_call(rx, &cp, srx, &p->call, GFP_KERNEL,
atomic_inc_return(&rxrpc_debug_id));
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
/* The socket is now unlocked */
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_leave(" = %p\n", call);
return call;
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/*
* send a message forming part of a client call through an RxRPC socket
* - caller holds the socket locked
* - the socket may be either a client socket or a server socket
*/
int rxrpc_do_sendmsg(struct rxrpc_sock *rx, struct msghdr *msg, size_t len)
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
__releases(&rx->sk.sk_lock.slock)
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
{
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
enum rxrpc_call_state state;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
struct rxrpc_call *call;
rxrpc: Fix call timeouts Fix the rxrpc call expiration timeouts and make them settable from userspace. By analogy with other rx implementations, there should be three timeouts: (1) "Normal timeout" This is set for all calls and is triggered if we haven't received any packets from the peer in a while. It is measured from the last time we received any packet on that call. This is not reset by any connection packets (such as CHALLENGE/RESPONSE packets). If a service operation takes a long time, the server should generate PING ACKs at a duration that's substantially less than the normal timeout so is to keep both sides alive. This is set at 1/6 of normal timeout. (2) "Idle timeout" This is set only for a service call and is triggered if we stop receiving the DATA packets that comprise the request data. It is measured from the last time we received a DATA packet. (3) "Hard timeout" This can be set for a call and specified the maximum lifetime of that call. It should not be specified by default. Some operations (such as volume transfer) take a long time. Allow userspace to set/change the timeouts on a call with sendmsg, using a control message: RXRPC_SET_CALL_TIMEOUTS The data to the message is a number of 32-bit words, not all of which need be given: u32 hard_timeout; /* sec from first packet */ u32 idle_timeout; /* msec from packet Rx */ u32 normal_timeout; /* msec from data Rx */ This can be set in combination with any other sendmsg() that affects a call. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
unsigned long now, j;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
int ret;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
struct rxrpc_send_params p = {
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
.call.tx_total_len = -1,
.call.user_call_ID = 0,
rxrpc: Fix call timeouts Fix the rxrpc call expiration timeouts and make them settable from userspace. By analogy with other rx implementations, there should be three timeouts: (1) "Normal timeout" This is set for all calls and is triggered if we haven't received any packets from the peer in a while. It is measured from the last time we received any packet on that call. This is not reset by any connection packets (such as CHALLENGE/RESPONSE packets). If a service operation takes a long time, the server should generate PING ACKs at a duration that's substantially less than the normal timeout so is to keep both sides alive. This is set at 1/6 of normal timeout. (2) "Idle timeout" This is set only for a service call and is triggered if we stop receiving the DATA packets that comprise the request data. It is measured from the last time we received a DATA packet. (3) "Hard timeout" This can be set for a call and specified the maximum lifetime of that call. It should not be specified by default. Some operations (such as volume transfer) take a long time. Allow userspace to set/change the timeouts on a call with sendmsg, using a control message: RXRPC_SET_CALL_TIMEOUTS The data to the message is a number of 32-bit words, not all of which need be given: u32 hard_timeout; /* sec from first packet */ u32 idle_timeout; /* msec from packet Rx */ u32 normal_timeout; /* msec from data Rx */ This can be set in combination with any other sendmsg() that affects a call. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
.call.nr_timeouts = 0,
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
.abort_code = 0,
.command = RXRPC_CMD_SEND_DATA,
.exclusive = false,
.upgrade = false,
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
};
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_enter("");
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
ret = rxrpc_sendmsg_cmsg(msg, &p);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (ret < 0)
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
goto error_release_sock;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
if (p.command == RXRPC_CMD_ACCEPT) {
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
ret = -EINVAL;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (rx->sk.sk_state != RXRPC_SERVER_LISTENING)
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
goto error_release_sock;
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
call = rxrpc_accept_call(rx, p.call.user_call_ID, NULL);
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
/* The socket is now unlocked. */
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (IS_ERR(call))
return PTR_ERR(call);
rxrpc: The mutex lock returned by rxrpc_accept_call() needs releasing The caller of rxrpc_accept_call() must release the lock on call->user_mutex returned by that function. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:40 +00:00
ret = 0;
goto out_put_unlock;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
call = rxrpc_find_call_by_user_ID(rx, p.call.user_call_ID);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (!call) {
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
ret = -EBADSLT;
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
if (p.command != RXRPC_CMD_SEND_DATA)
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
goto error_release_sock;
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
call = rxrpc_new_client_call_for_sendmsg(rx, msg, &p);
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
/* The socket is now unlocked... */
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
if (IS_ERR(call))
return PTR_ERR(call);
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
/* ... and we have the call lock. */
} else {
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
switch (READ_ONCE(call->state)) {
case RXRPC_CALL_UNINITIALISED:
case RXRPC_CALL_CLIENT_AWAIT_CONN:
case RXRPC_CALL_SERVER_PREALLOC:
case RXRPC_CALL_SERVER_SECURING:
case RXRPC_CALL_SERVER_ACCEPTING:
ret = -EBUSY;
rxrpc: Fix potential NULL-pointer exception Fix a potential NULL-pointer exception in rxrpc_do_sendmsg(). The call state check that I added should have gone into the else-body of the if-statement where we actually have a call to check. Found by CoverityScan CID#1414316 ("Dereference after null check"). Fixes: 540b1c48c37a ("rxrpc: Fix deadlock between call creation and sendmsg/recvmsg") Reported-by: Colin Ian King <colin.king@canonical.com> Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-02 23:48:52 +00:00
goto error_release_sock;
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
default:
break;
}
rxrpc: Fix potential NULL-pointer exception Fix a potential NULL-pointer exception in rxrpc_do_sendmsg(). The call state check that I added should have gone into the else-body of the if-statement where we actually have a call to check. Found by CoverityScan CID#1414316 ("Dereference after null check"). Fixes: 540b1c48c37a ("rxrpc: Fix deadlock between call creation and sendmsg/recvmsg") Reported-by: Colin Ian King <colin.king@canonical.com> Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-02 23:48:52 +00:00
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
ret = mutex_lock_interruptible(&call->user_mutex);
release_sock(&rx->sk);
if (ret < 0) {
ret = -ERESTARTSYS;
goto error_put;
}
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
if (p.call.tx_total_len != -1) {
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
ret = -EINVAL;
if (call->tx_total_len != -1 ||
call->tx_pending ||
call->tx_top != 0)
goto error_put;
rxrpc: Split the call params from the operation params When rxrpc_sendmsg() parses the control message buffer, it places the parameters extracted into a structure, but lumps together call parameters (such as user call ID) with operation parameters (such as whether to send data, send an abort or accept a call). Split the call parameters out into their own structure, a copy of which is then embedded in the operation parameters struct. The call parameters struct is then passed down into the places that need it instead of passing the individual parameters. This allows for extra call parameters to be added. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
call->tx_total_len = p.call.tx_total_len;
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
}
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Fix call timeouts Fix the rxrpc call expiration timeouts and make them settable from userspace. By analogy with other rx implementations, there should be three timeouts: (1) "Normal timeout" This is set for all calls and is triggered if we haven't received any packets from the peer in a while. It is measured from the last time we received any packet on that call. This is not reset by any connection packets (such as CHALLENGE/RESPONSE packets). If a service operation takes a long time, the server should generate PING ACKs at a duration that's substantially less than the normal timeout so is to keep both sides alive. This is set at 1/6 of normal timeout. (2) "Idle timeout" This is set only for a service call and is triggered if we stop receiving the DATA packets that comprise the request data. It is measured from the last time we received a DATA packet. (3) "Hard timeout" This can be set for a call and specified the maximum lifetime of that call. It should not be specified by default. Some operations (such as volume transfer) take a long time. Allow userspace to set/change the timeouts on a call with sendmsg, using a control message: RXRPC_SET_CALL_TIMEOUTS The data to the message is a number of 32-bit words, not all of which need be given: u32 hard_timeout; /* sec from first packet */ u32 idle_timeout; /* msec from packet Rx */ u32 normal_timeout; /* msec from data Rx */ This can be set in combination with any other sendmsg() that affects a call. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:41 +00:00
switch (p.call.nr_timeouts) {
case 3:
j = msecs_to_jiffies(p.call.timeouts.normal);
if (p.call.timeouts.normal > 0 && j == 0)
j = 1;
WRITE_ONCE(call->next_rx_timo, j);
/* Fall through */
case 2:
j = msecs_to_jiffies(p.call.timeouts.idle);
if (p.call.timeouts.idle > 0 && j == 0)
j = 1;
WRITE_ONCE(call->next_req_timo, j);
/* Fall through */
case 1:
if (p.call.timeouts.hard > 0) {
j = msecs_to_jiffies(p.call.timeouts.hard);
now = jiffies;
j += now;
WRITE_ONCE(call->expect_term_by, j);
rxrpc_reduce_call_timer(call, j, now,
rxrpc_timer_set_for_hard);
}
break;
}
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
state = READ_ONCE(call->state);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_debug("CALL %d USR %lx ST %d on CONN %p",
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
call->debug_id, call->user_call_ID, state, call->conn);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
if (state >= RXRPC_CALL_COMPLETE) {
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/* it's too late for this call */
ret = -ESHUTDOWN;
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
} else if (p.command == RXRPC_CMD_SEND_ABORT) {
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
ret = 0;
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
if (rxrpc_abort_call("CMD", call, 0, p.abort_code, -ECONNABORTED))
rxrpc: Fix warning by splitting rxrpc_send_call_packet() Split rxrpc_send_data_packet() to separate ACK generation (which is more complicated) from ABORT generation. This simplifies the code a bit and fixes the following warning: In file included from ../net/rxrpc/output.c:20:0: net/rxrpc/output.c: In function 'rxrpc_send_call_packet': net/rxrpc/ar-internal.h:1187:27: error: 'top' may be used uninitialized in this function [-Werror=maybe-uninitialized] net/rxrpc/output.c:103:24: note: 'top' was declared here net/rxrpc/output.c:225:25: error: 'hard_ack' may be used uninitialized in this function [-Werror=maybe-uninitialized] Reported-by: Arnd Bergmann <arnd@arndb.de> Signed-off-by: David Howells <dhowells@redhat.com>
2016-10-06 07:11:49 +00:00
ret = rxrpc_send_abort_packet(call);
rxrpc: Consolidate sendmsg parameters Consolidate the sendmsg control message parameters into a struct rather than passing them individually through the argument list of rxrpc_sendmsg_cmsg(). This makes it easier to add more parameters. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 13:41:52 +00:00
} else if (p.command != RXRPC_CMD_SEND_DATA) {
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
ret = -EINVAL;
} else if (rxrpc_is_client_call(call) &&
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
state != RXRPC_CALL_CLIENT_SEND_REQUEST) {
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/* request phase complete for this client call */
ret = -EPROTO;
} else if (rxrpc_is_service_call(call) &&
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
state != RXRPC_CALL_SERVER_ACK_REQUEST &&
state != RXRPC_CALL_SERVER_SEND_REPLY) {
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/* Reply phase not begun or not complete for service call. */
ret = -EPROTO;
} else {
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
ret = rxrpc_send_data(rx, call, msg, len, NULL);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: The mutex lock returned by rxrpc_accept_call() needs releasing The caller of rxrpc_accept_call() must release the lock on call->user_mutex returned by that function. Signed-off-by: David Howells <dhowells@redhat.com>
2017-11-24 10:18:40 +00:00
out_put_unlock:
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
mutex_unlock(&call->user_mutex);
error_put:
rxrpc: Improve the call tracking tracepoint Improve the call tracking tracepoint by showing more differentiation between some of the put and get events, including: (1) Getting and putting refs for the socket call user ID tree. (2) Getting and putting refs for queueing and failing to queue the call processor work item. Note that these aren't necessarily used in this patch, but will be taken advantage of in future patches. An enum is added for the event subtype numbers rather than coding them directly as decimal numbers and a table of 3-letter strings is provided rather than a sequence of ?: operators. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-07 13:34:21 +00:00
rxrpc_put_call(call, rxrpc_call_put);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_leave(" = %d", ret);
return ret;
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
error_release_sock:
release_sock(&rx->sk);
return ret;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/**
* rxrpc_kernel_send_data - Allow a kernel service to send data on a call
* @sock: The socket the call is on
* @call: The call to send data through
* @msg: The data to send
* @len: The amount of data to send
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
* @notify_end_tx: Notification that the last packet is queued.
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
*
* Allow a kernel service to send data on a call. The call must be in an state
* appropriate to sending data. No control data should be supplied in @msg,
* nor should an address be supplied. MSG_MORE should be flagged if there's
* more data to come, otherwise this data will end the transmission phase.
*/
int rxrpc_kernel_send_data(struct socket *sock, struct rxrpc_call *call,
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
struct msghdr *msg, size_t len,
rxrpc_notify_end_tx_t notify_end_tx)
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
{
int ret;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_enter("{%d,%s},", call->debug_id, rxrpc_call_states[call->state]);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
ASSERTCMP(msg->msg_name, ==, NULL);
ASSERTCMP(msg->msg_control, ==, NULL);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
mutex_lock(&call->user_mutex);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_debug("CALL %d USR %lx ST %d on CONN %p",
call->debug_id, call->user_call_ID, call->state, call->conn);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
switch (READ_ONCE(call->state)) {
case RXRPC_CALL_CLIENT_SEND_REQUEST:
case RXRPC_CALL_SERVER_ACK_REQUEST:
case RXRPC_CALL_SERVER_SEND_REPLY:
rxrpc: Add notification of end-of-Tx phase Add a callback to rxrpc_kernel_send_data() so that a kernel service can get a notification that the AF_RXRPC call has transitioned out the Tx phase and is now waiting for a reply or a final ACK. This is called from AF_RXRPC with the call state lock held so the notification is guaranteed to come before any reply is passed back. Further, modify the AFS filesystem to make use of this so that we don't have to change the afs_call state before sending the last bit of data. Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:56 +00:00
ret = rxrpc_send_data(rxrpc_sk(sock->sk), call, msg, len,
notify_end_tx);
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
break;
case RXRPC_CALL_COMPLETE:
rxrpc: rxrpc_kernel_send_data() needs to handle failed call better If rxrpc_kernel_send_data() is asked to send data through a call that has already failed (due to a remote abort, received protocol error or network error), then return the associated error code saved in the call rather than ESHUTDOWN. This allows the caller to work out whether to ask for the abort code or not based on this. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-09 08:10:32 +00:00
read_lock_bh(&call->state_lock);
rxrpc: Don't negate call->error before returning it call->error is stored as 0 or a negative error code. Don't negate this value (ie. make it positive) before returning it from a kernel function (though it should still be negated before passing to userspace through a control message). Signed-off-by: David Howells <dhowells@redhat.com>
2017-08-29 09:18:43 +00:00
ret = call->error;
rxrpc: rxrpc_kernel_send_data() needs to handle failed call better If rxrpc_kernel_send_data() is asked to send data through a call that has already failed (due to a remote abort, received protocol error or network error), then return the associated error code saved in the call rather than ESHUTDOWN. This allows the caller to work out whether to ask for the abort code or not based on this. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-09 08:10:32 +00:00
read_unlock_bh(&call->state_lock);
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
break;
default:
rxrpc: Trace protocol errors in received packets Add a tracepoint (rxrpc_rx_proto) to record protocol errors in received packets. The following changes are made: (1) Add a function, __rxrpc_abort_eproto(), to note a protocol error on a call and mark the call aborted. This is wrapped by rxrpc_abort_eproto() that makes the why string usable in trace. (2) Add trace_rxrpc_rx_proto() or rxrpc_abort_eproto() to protocol error generation points, replacing rxrpc_abort_call() with the latter. (3) Only send an abort packet in rxkad_verify_packet*() if we actually managed to abort the call. Note that a trace event is also emitted if a kernel user (e.g. afs) tries to send data through a call when it's not in the transmission phase, though it's not technically a receive event. Signed-off-by: David Howells <dhowells@redhat.com>
2017-04-06 09:12:00 +00:00
/* Request phase complete for this client call */
trace_rxrpc_rx_eproto(call, 0, tracepoint_string("late_send"));
rxrpc: Call state should be read with READ_ONCE() under some circumstances The call state may be changed at any time by the data-ready routine in response to received packets, so if the call state is to be read and acted upon several times in a function, READ_ONCE() must be used unless the call state lock is held. Signed-off-by: David Howells <dhowells@redhat.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-03-04 00:01:41 +00:00
ret = -EPROTO;
break;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
mutex_unlock(&call->user_mutex);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
_leave(" = %d", ret);
return ret;
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
EXPORT_SYMBOL(rxrpc_kernel_send_data);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
/**
* rxrpc_kernel_abort_call - Allow a kernel service to abort a call
* @sock: The socket the call is on
* @call: The call to be aborted
* @abort_code: The abort code to stick into the ABORT packet
rxrpc: Add tracepoint for working out where aborts happen Add a tracepoint for working out where local aborts happen. Each tracepoint call is labelled with a 3-letter code so that they can be distinguished - and the DATA sequence number is added too where available. rxrpc_kernel_abort_call() also takes a 3-letter code so that AFS can indicate the circumstances when it aborts a call. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-06 21:19:51 +00:00
* @error: Local error value
* @why: 3-char string indicating why.
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
*
rxrpc: Note a successfully aborted kernel operation Make rxrpc_kernel_abort_call() return an indication as to whether it actually aborted the operation or not so that kafs can trace the failure of the operation. Note that 'success' in this context means changing the state of the call, not necessarily successfully transmitting an ABORT packet. Signed-off-by: David Howells <dhowells@redhat.com>
2017-04-06 09:11:59 +00:00
* Allow a kernel service to abort a call, if it's still in an abortable state
* and return true if the call was aborted, false if it was already complete.
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
*/
rxrpc: Note a successfully aborted kernel operation Make rxrpc_kernel_abort_call() return an indication as to whether it actually aborted the operation or not so that kafs can trace the failure of the operation. Note that 'success' in this context means changing the state of the call, not necessarily successfully transmitting an ABORT packet. Signed-off-by: David Howells <dhowells@redhat.com>
2017-04-06 09:11:59 +00:00
bool rxrpc_kernel_abort_call(struct socket *sock, struct rxrpc_call *call,
rxrpc: Add tracepoint for working out where aborts happen Add a tracepoint for working out where local aborts happen. Each tracepoint call is labelled with a 3-letter code so that they can be distinguished - and the DATA sequence number is added too where available. rxrpc_kernel_abort_call() also takes a 3-letter code so that AFS can indicate the circumstances when it aborts a call. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-06 21:19:51 +00:00
u32 abort_code, int error, const char *why)
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
{
rxrpc: Note a successfully aborted kernel operation Make rxrpc_kernel_abort_call() return an indication as to whether it actually aborted the operation or not so that kafs can trace the failure of the operation. Note that 'success' in this context means changing the state of the call, not necessarily successfully transmitting an ABORT packet. Signed-off-by: David Howells <dhowells@redhat.com>
2017-04-06 09:11:59 +00:00
bool aborted;
rxrpc: Add tracepoint for working out where aborts happen Add a tracepoint for working out where local aborts happen. Each tracepoint call is labelled with a 3-letter code so that they can be distinguished - and the DATA sequence number is added too where available. rxrpc_kernel_abort_call() also takes a 3-letter code so that AFS can indicate the circumstances when it aborts a call. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-06 21:19:51 +00:00
_enter("{%d},%d,%d,%s", call->debug_id, abort_code, error, why);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
mutex_lock(&call->user_mutex);
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Note a successfully aborted kernel operation Make rxrpc_kernel_abort_call() return an indication as to whether it actually aborted the operation or not so that kafs can trace the failure of the operation. Note that 'success' in this context means changing the state of the call, not necessarily successfully transmitting an ABORT packet. Signed-off-by: David Howells <dhowells@redhat.com>
2017-04-06 09:11:59 +00:00
aborted = rxrpc_abort_call(why, call, 0, abort_code, error);
if (aborted)
rxrpc: Fix warning by splitting rxrpc_send_call_packet() Split rxrpc_send_data_packet() to separate ACK generation (which is more complicated) from ABORT generation. This simplifies the code a bit and fixes the following warning: In file included from ../net/rxrpc/output.c:20:0: net/rxrpc/output.c: In function 'rxrpc_send_call_packet': net/rxrpc/ar-internal.h:1187:27: error: 'top' may be used uninitialized in this function [-Werror=maybe-uninitialized] net/rxrpc/output.c:103:24: note: 'top' was declared here net/rxrpc/output.c:225:25: error: 'hard_ack' may be used uninitialized in this function [-Werror=maybe-uninitialized] Reported-by: Arnd Bergmann <arnd@arndb.de> Signed-off-by: David Howells <dhowells@redhat.com>
2016-10-06 07:11:49 +00:00
rxrpc_send_abort_packet(call);
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
rxrpc: Fix deadlock between call creation and sendmsg/recvmsg All the routines by which rxrpc is accessed from the outside are serialised by means of the socket lock (sendmsg, recvmsg, bind, rxrpc_kernel_begin_call(), ...) and this presents a problem: (1) If a number of calls on the same socket are in the process of connection to the same peer, a maximum of four concurrent live calls are permitted before further calls need to wait for a slot. (2) If a call is waiting for a slot, it is deep inside sendmsg() or rxrpc_kernel_begin_call() and the entry function is holding the socket lock. (3) sendmsg() and recvmsg() or the in-kernel equivalents are prevented from servicing the other calls as they need to take the socket lock to do so. (4) The socket is stuck until a call is aborted and makes its slot available to the waiter. Fix this by: (1) Provide each call with a mutex ('user_mutex') that arbitrates access by the users of rxrpc separately for each specific call. (2) Make rxrpc_sendmsg() and rxrpc_recvmsg() unlock the socket as soon as they've got a call and taken its mutex. Note that I'm returning EWOULDBLOCK from recvmsg() if MSG_DONTWAIT is set but someone else has the lock. Should I instead only return EWOULDBLOCK if there's nothing currently to be done on a socket, and sleep in this particular instance because there is something to be done, but we appear to be blocked by the interrupt handler doing its ping? (3) Make rxrpc_new_client_call() unlock the socket after allocating a new call, locking its user mutex and adding it to the socket's call tree. The call is returned locked so that sendmsg() can add data to it immediately. From the moment the call is in the socket tree, it is subject to access by sendmsg() and recvmsg() - even if it isn't connected yet. (4) Lock new service calls in the UDP data_ready handler (in rxrpc_new_incoming_call()) because they may already be in the socket's tree and the data_ready handler makes them live immediately if a user ID has already been preassigned. Note that the new call is locked before any notifications are sent that it is live, so doing mutex_trylock() *ought* to always succeed. Userspace is prevented from doing sendmsg() on calls that are in a too-early state in rxrpc_do_sendmsg(). (5) Make rxrpc_new_incoming_call() return the call with the user mutex held so that a ping can be scheduled immediately under it. Note that it might be worth moving the ping call into rxrpc_new_incoming_call() and then we can drop the mutex there. (6) Make rxrpc_accept_call() take the lock on the call it is accepting and release the socket after adding the call to the socket's tree. This is slightly tricky as we've dequeued the call by that point and have to requeue it. Note that requeuing emits a trace event. (7) Make rxrpc_kernel_send_data() and rxrpc_kernel_recv_data() take the new mutex immediately and don't bother with the socket mutex at all. This patch has the nice bonus that calls on the same socket are now to some extent parallelisable. Note that we might want to move rxrpc_service_prealloc() calls out from the socket lock and give it its own lock, so that we don't hang progress in other calls because we're waiting for the allocator. We probably also want to avoid calling rxrpc_notify_socket() from within the socket lock (rxrpc_accept_call()). Signed-off-by: David Howells <dhowells@redhat.com> Tested-by: Marc Dionne <marc.c.dionne@auristor.com> Signed-off-by: David S. Miller <davem@davemloft.net>
2017-02-27 15:43:06 +00:00
mutex_unlock(&call->user_mutex);
rxrpc: Note a successfully aborted kernel operation Make rxrpc_kernel_abort_call() return an indication as to whether it actually aborted the operation or not so that kafs can trace the failure of the operation. Note that 'success' in this context means changing the state of the call, not necessarily successfully transmitting an ABORT packet. Signed-off-by: David Howells <dhowells@redhat.com>
2017-04-06 09:11:59 +00:00
return aborted;
rxrpc: Split sendmsg from packet transmission code Split the sendmsg code from the packet transmission code (mostly to be found in output.c). Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
}
rxrpc: Rearrange net/rxrpc/sendmsg.c Rearrange net/rxrpc/sendmsg.c to be in a more logical order. This makes it easier to follow and eliminates forward declarations. Signed-off-by: David Howells <dhowells@redhat.com>
2016-09-02 21:39:45 +00:00
EXPORT_SYMBOL(rxrpc_kernel_abort_call);
rxrpc: Provide a cmsg to specify the amount of Tx data for a call Provide a control message that can be specified on the first sendmsg() of a client call or the first sendmsg() of a service response to indicate the total length of the data to be transmitted for that call. Currently, because the length of the payload of an encrypted DATA packet is encrypted in front of the data, the packet cannot be encrypted until we know how much data it will hold. By specifying the length at the beginning of the transmit phase, each DATA packet length can be set before we start loading data from userspace (where several sendmsg() calls may contribute to a particular packet). An error will be returned if too little or too much data is presented in the Tx phase. Signed-off-by: David Howells <dhowells@redhat.com>
2017-06-07 11:40:03 +00:00
/**
* rxrpc_kernel_set_tx_length - Set the total Tx length on a call
* @sock: The socket the call is on
* @call: The call to be informed
* @tx_total_len: The amount of data to be transmitted for this call
*
* Allow a kernel service to set the total transmit length on a call. This
* allows buffer-to-packet encrypt-and-copy to be performed.
*
* This function is primarily for use for setting the reply length since the
* request length can be set when beginning the call.
*/
void rxrpc_kernel_set_tx_length(struct socket *sock, struct rxrpc_call *call,
s64 tx_total_len)
{
WARN_ON(call->tx_total_len != -1);
call->tx_total_len = tx_total_len;
}
EXPORT_SYMBOL(rxrpc_kernel_set_tx_length);