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https://git.kernel.org/pub/scm/linux/kernel/git/stable/linux.git
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![Linus Torvalds](/assets/img/avatar_default.png)
Pull percpu updates from Tejun Heo:
"A lot of activities on percpu front. Notable changes are...
- percpu allocator now can take @gfp. If @gfp doesn't contain
GFP_KERNEL, it tries to allocate from what's already available to
the allocator and a work item tries to keep the reserve around
certain level so that these atomic allocations usually succeed.
This will replace the ad-hoc percpu memory pool used by
blk-throttle and also be used by the planned blkcg support for
writeback IOs.
Please note that I noticed a bug in how @gfp is interpreted while
preparing this pull request and applied the fix 6ae833c7fe
("percpu: fix how @gfp is interpreted by the percpu allocator")
just now.
- percpu_ref now uses longs for percpu and global counters instead of
ints. It leads to more sparse packing of the percpu counters on
64bit machines but the overhead should be negligible and this
allows using percpu_ref for refcnting pages and in-memory objects
directly.
- The switching between percpu and single counter modes of a
percpu_ref is made independent of putting the base ref and a
percpu_ref can now optionally be initialized in single or killed
mode. This allows avoiding percpu shutdown latency for cases where
the refcounted objects may be synchronously created and destroyed
in rapid succession with only a fraction of them reaching fully
operational status (SCSI probing does this when combined with
blk-mq support). It's also planned to be used to implement forced
single mode to detect underflow more timely for debugging.
There's a separate branch percpu/for-3.18-consistent-ops which cleans
up the duplicate percpu accessors. That branch causes a number of
conflicts with s390 and other trees. I'll send a separate pull
request w/ resolutions once other branches are merged"
* 'for-3.18' of git://git.kernel.org/pub/scm/linux/kernel/git/tj/percpu: (33 commits)
percpu: fix how @gfp is interpreted by the percpu allocator
blk-mq, percpu_ref: start q->mq_usage_counter in atomic mode
percpu_ref: make INIT_ATOMIC and switch_to_atomic() sticky
percpu_ref: add PERCPU_REF_INIT_* flags
percpu_ref: decouple switching to percpu mode and reinit
percpu_ref: decouple switching to atomic mode and killing
percpu_ref: add PCPU_REF_DEAD
percpu_ref: rename things to prepare for decoupling percpu/atomic mode switch
percpu_ref: replace pcpu_ prefix with percpu_
percpu_ref: minor code and comment updates
percpu_ref: relocate percpu_ref_reinit()
Revert "blk-mq, percpu_ref: implement a kludge for SCSI blk-mq stall during probe"
Revert "percpu: free percpu allocation info for uniprocessor system"
percpu-refcount: make percpu_ref based on longs instead of ints
percpu-refcount: improve WARN messages
percpu: fix locking regression in the failure path of pcpu_alloc()
percpu-refcount: add @gfp to percpu_ref_init()
proportions: add @gfp to init functions
percpu_counter: add @gfp to percpu_counter_init()
percpu_counter: make percpu_counters_lock irq-safe
...
2449 lines
74 KiB
C
2449 lines
74 KiB
C
/*
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* mm/page-writeback.c
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*
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* Copyright (C) 2002, Linus Torvalds.
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* Copyright (C) 2007 Red Hat, Inc., Peter Zijlstra <pzijlstr@redhat.com>
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*
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* Contains functions related to writing back dirty pages at the
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* address_space level.
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*
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* 10Apr2002 Andrew Morton
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* Initial version
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*/
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#include <linux/kernel.h>
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#include <linux/export.h>
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#include <linux/spinlock.h>
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#include <linux/fs.h>
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#include <linux/mm.h>
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#include <linux/swap.h>
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#include <linux/slab.h>
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#include <linux/pagemap.h>
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#include <linux/writeback.h>
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#include <linux/init.h>
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#include <linux/backing-dev.h>
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#include <linux/task_io_accounting_ops.h>
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#include <linux/blkdev.h>
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#include <linux/mpage.h>
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#include <linux/rmap.h>
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#include <linux/percpu.h>
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#include <linux/notifier.h>
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#include <linux/smp.h>
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#include <linux/sysctl.h>
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#include <linux/cpu.h>
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#include <linux/syscalls.h>
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#include <linux/buffer_head.h> /* __set_page_dirty_buffers */
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#include <linux/pagevec.h>
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#include <linux/timer.h>
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#include <linux/sched/rt.h>
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#include <linux/mm_inline.h>
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#include <trace/events/writeback.h>
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#include "internal.h"
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/*
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* Sleep at most 200ms at a time in balance_dirty_pages().
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*/
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#define MAX_PAUSE max(HZ/5, 1)
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/*
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* Try to keep balance_dirty_pages() call intervals higher than this many pages
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* by raising pause time to max_pause when falls below it.
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*/
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#define DIRTY_POLL_THRESH (128 >> (PAGE_SHIFT - 10))
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/*
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* Estimate write bandwidth at 200ms intervals.
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*/
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#define BANDWIDTH_INTERVAL max(HZ/5, 1)
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#define RATELIMIT_CALC_SHIFT 10
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/*
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* After a CPU has dirtied this many pages, balance_dirty_pages_ratelimited
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* will look to see if it needs to force writeback or throttling.
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*/
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static long ratelimit_pages = 32;
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/* The following parameters are exported via /proc/sys/vm */
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/*
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* Start background writeback (via writeback threads) at this percentage
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*/
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int dirty_background_ratio = 10;
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/*
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* dirty_background_bytes starts at 0 (disabled) so that it is a function of
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* dirty_background_ratio * the amount of dirtyable memory
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*/
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unsigned long dirty_background_bytes;
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/*
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* free highmem will not be subtracted from the total free memory
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* for calculating free ratios if vm_highmem_is_dirtyable is true
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*/
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int vm_highmem_is_dirtyable;
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/*
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* The generator of dirty data starts writeback at this percentage
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*/
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int vm_dirty_ratio = 20;
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/*
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* vm_dirty_bytes starts at 0 (disabled) so that it is a function of
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* vm_dirty_ratio * the amount of dirtyable memory
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*/
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unsigned long vm_dirty_bytes;
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/*
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* The interval between `kupdate'-style writebacks
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*/
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unsigned int dirty_writeback_interval = 5 * 100; /* centiseconds */
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EXPORT_SYMBOL_GPL(dirty_writeback_interval);
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/*
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* The longest time for which data is allowed to remain dirty
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*/
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unsigned int dirty_expire_interval = 30 * 100; /* centiseconds */
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/*
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* Flag that makes the machine dump writes/reads and block dirtyings.
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*/
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int block_dump;
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/*
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* Flag that puts the machine in "laptop mode". Doubles as a timeout in jiffies:
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* a full sync is triggered after this time elapses without any disk activity.
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*/
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int laptop_mode;
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EXPORT_SYMBOL(laptop_mode);
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/* End of sysctl-exported parameters */
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unsigned long global_dirty_limit;
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/*
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* Scale the writeback cache size proportional to the relative writeout speeds.
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*
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* We do this by keeping a floating proportion between BDIs, based on page
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* writeback completions [end_page_writeback()]. Those devices that write out
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* pages fastest will get the larger share, while the slower will get a smaller
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* share.
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*
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* We use page writeout completions because we are interested in getting rid of
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* dirty pages. Having them written out is the primary goal.
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*
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* We introduce a concept of time, a period over which we measure these events,
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* because demand can/will vary over time. The length of this period itself is
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* measured in page writeback completions.
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*
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*/
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static struct fprop_global writeout_completions;
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static void writeout_period(unsigned long t);
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/* Timer for aging of writeout_completions */
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static struct timer_list writeout_period_timer =
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TIMER_DEFERRED_INITIALIZER(writeout_period, 0, 0);
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static unsigned long writeout_period_time = 0;
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/*
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* Length of period for aging writeout fractions of bdis. This is an
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* arbitrarily chosen number. The longer the period, the slower fractions will
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* reflect changes in current writeout rate.
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*/
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#define VM_COMPLETIONS_PERIOD_LEN (3*HZ)
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/*
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* In a memory zone, there is a certain amount of pages we consider
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* available for the page cache, which is essentially the number of
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* free and reclaimable pages, minus some zone reserves to protect
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* lowmem and the ability to uphold the zone's watermarks without
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* requiring writeback.
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*
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* This number of dirtyable pages is the base value of which the
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* user-configurable dirty ratio is the effictive number of pages that
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* are allowed to be actually dirtied. Per individual zone, or
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* globally by using the sum of dirtyable pages over all zones.
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*
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* Because the user is allowed to specify the dirty limit globally as
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* absolute number of bytes, calculating the per-zone dirty limit can
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* require translating the configured limit into a percentage of
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* global dirtyable memory first.
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*/
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/**
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* zone_dirtyable_memory - number of dirtyable pages in a zone
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* @zone: the zone
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*
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* Returns the zone's number of pages potentially available for dirty
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* page cache. This is the base value for the per-zone dirty limits.
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*/
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static unsigned long zone_dirtyable_memory(struct zone *zone)
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{
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unsigned long nr_pages;
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nr_pages = zone_page_state(zone, NR_FREE_PAGES);
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nr_pages -= min(nr_pages, zone->dirty_balance_reserve);
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nr_pages += zone_page_state(zone, NR_INACTIVE_FILE);
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nr_pages += zone_page_state(zone, NR_ACTIVE_FILE);
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return nr_pages;
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}
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static unsigned long highmem_dirtyable_memory(unsigned long total)
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{
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#ifdef CONFIG_HIGHMEM
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int node;
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unsigned long x = 0;
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for_each_node_state(node, N_HIGH_MEMORY) {
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struct zone *z = &NODE_DATA(node)->node_zones[ZONE_HIGHMEM];
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x += zone_dirtyable_memory(z);
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}
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/*
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* Unreclaimable memory (kernel memory or anonymous memory
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* without swap) can bring down the dirtyable pages below
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* the zone's dirty balance reserve and the above calculation
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* will underflow. However we still want to add in nodes
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* which are below threshold (negative values) to get a more
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* accurate calculation but make sure that the total never
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* underflows.
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*/
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if ((long)x < 0)
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x = 0;
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/*
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* Make sure that the number of highmem pages is never larger
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* than the number of the total dirtyable memory. This can only
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* occur in very strange VM situations but we want to make sure
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* that this does not occur.
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*/
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return min(x, total);
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#else
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return 0;
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#endif
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}
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/**
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* global_dirtyable_memory - number of globally dirtyable pages
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*
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* Returns the global number of pages potentially available for dirty
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* page cache. This is the base value for the global dirty limits.
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*/
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static unsigned long global_dirtyable_memory(void)
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{
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unsigned long x;
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x = global_page_state(NR_FREE_PAGES);
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x -= min(x, dirty_balance_reserve);
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x += global_page_state(NR_INACTIVE_FILE);
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x += global_page_state(NR_ACTIVE_FILE);
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if (!vm_highmem_is_dirtyable)
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x -= highmem_dirtyable_memory(x);
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return x + 1; /* Ensure that we never return 0 */
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}
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/*
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* global_dirty_limits - background-writeback and dirty-throttling thresholds
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*
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* Calculate the dirty thresholds based on sysctl parameters
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* - vm.dirty_background_ratio or vm.dirty_background_bytes
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* - vm.dirty_ratio or vm.dirty_bytes
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* The dirty limits will be lifted by 1/4 for PF_LESS_THROTTLE (ie. nfsd) and
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* real-time tasks.
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*/
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void global_dirty_limits(unsigned long *pbackground, unsigned long *pdirty)
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{
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const unsigned long available_memory = global_dirtyable_memory();
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unsigned long background;
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unsigned long dirty;
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struct task_struct *tsk;
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if (vm_dirty_bytes)
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dirty = DIV_ROUND_UP(vm_dirty_bytes, PAGE_SIZE);
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else
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dirty = (vm_dirty_ratio * available_memory) / 100;
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if (dirty_background_bytes)
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background = DIV_ROUND_UP(dirty_background_bytes, PAGE_SIZE);
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else
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background = (dirty_background_ratio * available_memory) / 100;
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if (background >= dirty)
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background = dirty / 2;
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tsk = current;
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if (tsk->flags & PF_LESS_THROTTLE || rt_task(tsk)) {
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background += background / 4;
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dirty += dirty / 4;
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}
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*pbackground = background;
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*pdirty = dirty;
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trace_global_dirty_state(background, dirty);
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}
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/**
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* zone_dirty_limit - maximum number of dirty pages allowed in a zone
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* @zone: the zone
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*
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* Returns the maximum number of dirty pages allowed in a zone, based
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* on the zone's dirtyable memory.
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*/
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static unsigned long zone_dirty_limit(struct zone *zone)
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{
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unsigned long zone_memory = zone_dirtyable_memory(zone);
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struct task_struct *tsk = current;
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unsigned long dirty;
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if (vm_dirty_bytes)
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dirty = DIV_ROUND_UP(vm_dirty_bytes, PAGE_SIZE) *
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zone_memory / global_dirtyable_memory();
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else
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dirty = vm_dirty_ratio * zone_memory / 100;
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if (tsk->flags & PF_LESS_THROTTLE || rt_task(tsk))
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dirty += dirty / 4;
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return dirty;
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}
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/**
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* zone_dirty_ok - tells whether a zone is within its dirty limits
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* @zone: the zone to check
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*
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* Returns %true when the dirty pages in @zone are within the zone's
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* dirty limit, %false if the limit is exceeded.
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*/
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bool zone_dirty_ok(struct zone *zone)
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{
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unsigned long limit = zone_dirty_limit(zone);
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return zone_page_state(zone, NR_FILE_DIRTY) +
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zone_page_state(zone, NR_UNSTABLE_NFS) +
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zone_page_state(zone, NR_WRITEBACK) <= limit;
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}
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int dirty_background_ratio_handler(struct ctl_table *table, int write,
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void __user *buffer, size_t *lenp,
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loff_t *ppos)
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{
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int ret;
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ret = proc_dointvec_minmax(table, write, buffer, lenp, ppos);
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if (ret == 0 && write)
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dirty_background_bytes = 0;
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return ret;
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}
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int dirty_background_bytes_handler(struct ctl_table *table, int write,
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void __user *buffer, size_t *lenp,
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loff_t *ppos)
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{
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int ret;
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ret = proc_doulongvec_minmax(table, write, buffer, lenp, ppos);
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if (ret == 0 && write)
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dirty_background_ratio = 0;
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return ret;
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}
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int dirty_ratio_handler(struct ctl_table *table, int write,
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void __user *buffer, size_t *lenp,
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loff_t *ppos)
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{
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int old_ratio = vm_dirty_ratio;
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int ret;
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ret = proc_dointvec_minmax(table, write, buffer, lenp, ppos);
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if (ret == 0 && write && vm_dirty_ratio != old_ratio) {
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writeback_set_ratelimit();
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vm_dirty_bytes = 0;
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}
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return ret;
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}
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int dirty_bytes_handler(struct ctl_table *table, int write,
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void __user *buffer, size_t *lenp,
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loff_t *ppos)
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{
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unsigned long old_bytes = vm_dirty_bytes;
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int ret;
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ret = proc_doulongvec_minmax(table, write, buffer, lenp, ppos);
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if (ret == 0 && write && vm_dirty_bytes != old_bytes) {
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writeback_set_ratelimit();
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vm_dirty_ratio = 0;
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}
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return ret;
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}
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static unsigned long wp_next_time(unsigned long cur_time)
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{
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cur_time += VM_COMPLETIONS_PERIOD_LEN;
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/* 0 has a special meaning... */
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if (!cur_time)
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return 1;
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return cur_time;
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}
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/*
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* Increment the BDI's writeout completion count and the global writeout
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* completion count. Called from test_clear_page_writeback().
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*/
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static inline void __bdi_writeout_inc(struct backing_dev_info *bdi)
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{
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__inc_bdi_stat(bdi, BDI_WRITTEN);
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__fprop_inc_percpu_max(&writeout_completions, &bdi->completions,
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bdi->max_prop_frac);
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/* First event after period switching was turned off? */
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if (!unlikely(writeout_period_time)) {
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/*
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* We can race with other __bdi_writeout_inc calls here but
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* it does not cause any harm since the resulting time when
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* timer will fire and what is in writeout_period_time will be
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* roughly the same.
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*/
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writeout_period_time = wp_next_time(jiffies);
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mod_timer(&writeout_period_timer, writeout_period_time);
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}
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}
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void bdi_writeout_inc(struct backing_dev_info *bdi)
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{
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unsigned long flags;
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local_irq_save(flags);
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__bdi_writeout_inc(bdi);
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local_irq_restore(flags);
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}
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EXPORT_SYMBOL_GPL(bdi_writeout_inc);
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|
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/*
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* Obtain an accurate fraction of the BDI's portion.
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*/
|
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static void bdi_writeout_fraction(struct backing_dev_info *bdi,
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long *numerator, long *denominator)
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{
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fprop_fraction_percpu(&writeout_completions, &bdi->completions,
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numerator, denominator);
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}
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|
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/*
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* On idle system, we can be called long after we scheduled because we use
|
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* deferred timers so count with missed periods.
|
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*/
|
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static void writeout_period(unsigned long t)
|
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{
|
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int miss_periods = (jiffies - writeout_period_time) /
|
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VM_COMPLETIONS_PERIOD_LEN;
|
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|
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if (fprop_new_period(&writeout_completions, miss_periods + 1)) {
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writeout_period_time = wp_next_time(writeout_period_time +
|
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miss_periods * VM_COMPLETIONS_PERIOD_LEN);
|
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mod_timer(&writeout_period_timer, writeout_period_time);
|
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} else {
|
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/*
|
|
* Aging has zeroed all fractions. Stop wasting CPU on period
|
|
* updates.
|
|
*/
|
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writeout_period_time = 0;
|
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}
|
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}
|
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|
|
/*
|
|
* bdi_min_ratio keeps the sum of the minimum dirty shares of all
|
|
* registered backing devices, which, for obvious reasons, can not
|
|
* exceed 100%.
|
|
*/
|
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static unsigned int bdi_min_ratio;
|
|
|
|
int bdi_set_min_ratio(struct backing_dev_info *bdi, unsigned int min_ratio)
|
|
{
|
|
int ret = 0;
|
|
|
|
spin_lock_bh(&bdi_lock);
|
|
if (min_ratio > bdi->max_ratio) {
|
|
ret = -EINVAL;
|
|
} else {
|
|
min_ratio -= bdi->min_ratio;
|
|
if (bdi_min_ratio + min_ratio < 100) {
|
|
bdi_min_ratio += min_ratio;
|
|
bdi->min_ratio += min_ratio;
|
|
} else {
|
|
ret = -EINVAL;
|
|
}
|
|
}
|
|
spin_unlock_bh(&bdi_lock);
|
|
|
|
return ret;
|
|
}
|
|
|
|
int bdi_set_max_ratio(struct backing_dev_info *bdi, unsigned max_ratio)
|
|
{
|
|
int ret = 0;
|
|
|
|
if (max_ratio > 100)
|
|
return -EINVAL;
|
|
|
|
spin_lock_bh(&bdi_lock);
|
|
if (bdi->min_ratio > max_ratio) {
|
|
ret = -EINVAL;
|
|
} else {
|
|
bdi->max_ratio = max_ratio;
|
|
bdi->max_prop_frac = (FPROP_FRAC_BASE * max_ratio) / 100;
|
|
}
|
|
spin_unlock_bh(&bdi_lock);
|
|
|
|
return ret;
|
|
}
|
|
EXPORT_SYMBOL(bdi_set_max_ratio);
|
|
|
|
static unsigned long dirty_freerun_ceiling(unsigned long thresh,
|
|
unsigned long bg_thresh)
|
|
{
|
|
return (thresh + bg_thresh) / 2;
|
|
}
|
|
|
|
static unsigned long hard_dirty_limit(unsigned long thresh)
|
|
{
|
|
return max(thresh, global_dirty_limit);
|
|
}
|
|
|
|
/**
|
|
* bdi_dirty_limit - @bdi's share of dirty throttling threshold
|
|
* @bdi: the backing_dev_info to query
|
|
* @dirty: global dirty limit in pages
|
|
*
|
|
* Returns @bdi's dirty limit in pages. The term "dirty" in the context of
|
|
* dirty balancing includes all PG_dirty, PG_writeback and NFS unstable pages.
|
|
*
|
|
* Note that balance_dirty_pages() will only seriously take it as a hard limit
|
|
* when sleeping max_pause per page is not enough to keep the dirty pages under
|
|
* control. For example, when the device is completely stalled due to some error
|
|
* conditions, or when there are 1000 dd tasks writing to a slow 10MB/s USB key.
|
|
* In the other normal situations, it acts more gently by throttling the tasks
|
|
* more (rather than completely block them) when the bdi dirty pages go high.
|
|
*
|
|
* It allocates high/low dirty limits to fast/slow devices, in order to prevent
|
|
* - starving fast devices
|
|
* - piling up dirty pages (that will take long time to sync) on slow devices
|
|
*
|
|
* The bdi's share of dirty limit will be adapting to its throughput and
|
|
* bounded by the bdi->min_ratio and/or bdi->max_ratio parameters, if set.
|
|
*/
|
|
unsigned long bdi_dirty_limit(struct backing_dev_info *bdi, unsigned long dirty)
|
|
{
|
|
u64 bdi_dirty;
|
|
long numerator, denominator;
|
|
|
|
/*
|
|
* Calculate this BDI's share of the dirty ratio.
|
|
*/
|
|
bdi_writeout_fraction(bdi, &numerator, &denominator);
|
|
|
|
bdi_dirty = (dirty * (100 - bdi_min_ratio)) / 100;
|
|
bdi_dirty *= numerator;
|
|
do_div(bdi_dirty, denominator);
|
|
|
|
bdi_dirty += (dirty * bdi->min_ratio) / 100;
|
|
if (bdi_dirty > (dirty * bdi->max_ratio) / 100)
|
|
bdi_dirty = dirty * bdi->max_ratio / 100;
|
|
|
|
return bdi_dirty;
|
|
}
|
|
|
|
/*
|
|
* setpoint - dirty 3
|
|
* f(dirty) := 1.0 + (----------------)
|
|
* limit - setpoint
|
|
*
|
|
* it's a 3rd order polynomial that subjects to
|
|
*
|
|
* (1) f(freerun) = 2.0 => rampup dirty_ratelimit reasonably fast
|
|
* (2) f(setpoint) = 1.0 => the balance point
|
|
* (3) f(limit) = 0 => the hard limit
|
|
* (4) df/dx <= 0 => negative feedback control
|
|
* (5) the closer to setpoint, the smaller |df/dx| (and the reverse)
|
|
* => fast response on large errors; small oscillation near setpoint
|
|
*/
|
|
static long long pos_ratio_polynom(unsigned long setpoint,
|
|
unsigned long dirty,
|
|
unsigned long limit)
|
|
{
|
|
long long pos_ratio;
|
|
long x;
|
|
|
|
x = div64_s64(((s64)setpoint - (s64)dirty) << RATELIMIT_CALC_SHIFT,
|
|
limit - setpoint + 1);
|
|
pos_ratio = x;
|
|
pos_ratio = pos_ratio * x >> RATELIMIT_CALC_SHIFT;
|
|
pos_ratio = pos_ratio * x >> RATELIMIT_CALC_SHIFT;
|
|
pos_ratio += 1 << RATELIMIT_CALC_SHIFT;
|
|
|
|
return clamp(pos_ratio, 0LL, 2LL << RATELIMIT_CALC_SHIFT);
|
|
}
|
|
|
|
/*
|
|
* Dirty position control.
|
|
*
|
|
* (o) global/bdi setpoints
|
|
*
|
|
* We want the dirty pages be balanced around the global/bdi setpoints.
|
|
* When the number of dirty pages is higher/lower than the setpoint, the
|
|
* dirty position control ratio (and hence task dirty ratelimit) will be
|
|
* decreased/increased to bring the dirty pages back to the setpoint.
|
|
*
|
|
* pos_ratio = 1 << RATELIMIT_CALC_SHIFT
|
|
*
|
|
* if (dirty < setpoint) scale up pos_ratio
|
|
* if (dirty > setpoint) scale down pos_ratio
|
|
*
|
|
* if (bdi_dirty < bdi_setpoint) scale up pos_ratio
|
|
* if (bdi_dirty > bdi_setpoint) scale down pos_ratio
|
|
*
|
|
* task_ratelimit = dirty_ratelimit * pos_ratio >> RATELIMIT_CALC_SHIFT
|
|
*
|
|
* (o) global control line
|
|
*
|
|
* ^ pos_ratio
|
|
* |
|
|
* | |<===== global dirty control scope ======>|
|
|
* 2.0 .............*
|
|
* | .*
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* 1.0 ................................*
|
|
* | . . *
|
|
* | . . *
|
|
* | . . *
|
|
* | . . *
|
|
* | . . *
|
|
* 0 +------------.------------------.----------------------*------------->
|
|
* freerun^ setpoint^ limit^ dirty pages
|
|
*
|
|
* (o) bdi control line
|
|
*
|
|
* ^ pos_ratio
|
|
* |
|
|
* | *
|
|
* | *
|
|
* | *
|
|
* | *
|
|
* | * |<=========== span ============>|
|
|
* 1.0 .......................*
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* 1/4 ...............................................* * * * * * * * * * * *
|
|
* | . .
|
|
* | . .
|
|
* | . .
|
|
* 0 +----------------------.-------------------------------.------------->
|
|
* bdi_setpoint^ x_intercept^
|
|
*
|
|
* The bdi control line won't drop below pos_ratio=1/4, so that bdi_dirty can
|
|
* be smoothly throttled down to normal if it starts high in situations like
|
|
* - start writing to a slow SD card and a fast disk at the same time. The SD
|
|
* card's bdi_dirty may rush to many times higher than bdi_setpoint.
|
|
* - the bdi dirty thresh drops quickly due to change of JBOD workload
|
|
*/
|
|
static unsigned long bdi_position_ratio(struct backing_dev_info *bdi,
|
|
unsigned long thresh,
|
|
unsigned long bg_thresh,
|
|
unsigned long dirty,
|
|
unsigned long bdi_thresh,
|
|
unsigned long bdi_dirty)
|
|
{
|
|
unsigned long write_bw = bdi->avg_write_bandwidth;
|
|
unsigned long freerun = dirty_freerun_ceiling(thresh, bg_thresh);
|
|
unsigned long limit = hard_dirty_limit(thresh);
|
|
unsigned long x_intercept;
|
|
unsigned long setpoint; /* dirty pages' target balance point */
|
|
unsigned long bdi_setpoint;
|
|
unsigned long span;
|
|
long long pos_ratio; /* for scaling up/down the rate limit */
|
|
long x;
|
|
|
|
if (unlikely(dirty >= limit))
|
|
return 0;
|
|
|
|
/*
|
|
* global setpoint
|
|
*
|
|
* See comment for pos_ratio_polynom().
|
|
*/
|
|
setpoint = (freerun + limit) / 2;
|
|
pos_ratio = pos_ratio_polynom(setpoint, dirty, limit);
|
|
|
|
/*
|
|
* The strictlimit feature is a tool preventing mistrusted filesystems
|
|
* from growing a large number of dirty pages before throttling. For
|
|
* such filesystems balance_dirty_pages always checks bdi counters
|
|
* against bdi limits. Even if global "nr_dirty" is under "freerun".
|
|
* This is especially important for fuse which sets bdi->max_ratio to
|
|
* 1% by default. Without strictlimit feature, fuse writeback may
|
|
* consume arbitrary amount of RAM because it is accounted in
|
|
* NR_WRITEBACK_TEMP which is not involved in calculating "nr_dirty".
|
|
*
|
|
* Here, in bdi_position_ratio(), we calculate pos_ratio based on
|
|
* two values: bdi_dirty and bdi_thresh. Let's consider an example:
|
|
* total amount of RAM is 16GB, bdi->max_ratio is equal to 1%, global
|
|
* limits are set by default to 10% and 20% (background and throttle).
|
|
* Then bdi_thresh is 1% of 20% of 16GB. This amounts to ~8K pages.
|
|
* bdi_dirty_limit(bdi, bg_thresh) is about ~4K pages. bdi_setpoint is
|
|
* about ~6K pages (as the average of background and throttle bdi
|
|
* limits). The 3rd order polynomial will provide positive feedback if
|
|
* bdi_dirty is under bdi_setpoint and vice versa.
|
|
*
|
|
* Note, that we cannot use global counters in these calculations
|
|
* because we want to throttle process writing to a strictlimit BDI
|
|
* much earlier than global "freerun" is reached (~23MB vs. ~2.3GB
|
|
* in the example above).
|
|
*/
|
|
if (unlikely(bdi->capabilities & BDI_CAP_STRICTLIMIT)) {
|
|
long long bdi_pos_ratio;
|
|
unsigned long bdi_bg_thresh;
|
|
|
|
if (bdi_dirty < 8)
|
|
return min_t(long long, pos_ratio * 2,
|
|
2 << RATELIMIT_CALC_SHIFT);
|
|
|
|
if (bdi_dirty >= bdi_thresh)
|
|
return 0;
|
|
|
|
bdi_bg_thresh = div_u64((u64)bdi_thresh * bg_thresh, thresh);
|
|
bdi_setpoint = dirty_freerun_ceiling(bdi_thresh,
|
|
bdi_bg_thresh);
|
|
|
|
if (bdi_setpoint == 0 || bdi_setpoint == bdi_thresh)
|
|
return 0;
|
|
|
|
bdi_pos_ratio = pos_ratio_polynom(bdi_setpoint, bdi_dirty,
|
|
bdi_thresh);
|
|
|
|
/*
|
|
* Typically, for strictlimit case, bdi_setpoint << setpoint
|
|
* and pos_ratio >> bdi_pos_ratio. In the other words global
|
|
* state ("dirty") is not limiting factor and we have to
|
|
* make decision based on bdi counters. But there is an
|
|
* important case when global pos_ratio should get precedence:
|
|
* global limits are exceeded (e.g. due to activities on other
|
|
* BDIs) while given strictlimit BDI is below limit.
|
|
*
|
|
* "pos_ratio * bdi_pos_ratio" would work for the case above,
|
|
* but it would look too non-natural for the case of all
|
|
* activity in the system coming from a single strictlimit BDI
|
|
* with bdi->max_ratio == 100%.
|
|
*
|
|
* Note that min() below somewhat changes the dynamics of the
|
|
* control system. Normally, pos_ratio value can be well over 3
|
|
* (when globally we are at freerun and bdi is well below bdi
|
|
* setpoint). Now the maximum pos_ratio in the same situation
|
|
* is 2. We might want to tweak this if we observe the control
|
|
* system is too slow to adapt.
|
|
*/
|
|
return min(pos_ratio, bdi_pos_ratio);
|
|
}
|
|
|
|
/*
|
|
* We have computed basic pos_ratio above based on global situation. If
|
|
* the bdi is over/under its share of dirty pages, we want to scale
|
|
* pos_ratio further down/up. That is done by the following mechanism.
|
|
*/
|
|
|
|
/*
|
|
* bdi setpoint
|
|
*
|
|
* f(bdi_dirty) := 1.0 + k * (bdi_dirty - bdi_setpoint)
|
|
*
|
|
* x_intercept - bdi_dirty
|
|
* := --------------------------
|
|
* x_intercept - bdi_setpoint
|
|
*
|
|
* The main bdi control line is a linear function that subjects to
|
|
*
|
|
* (1) f(bdi_setpoint) = 1.0
|
|
* (2) k = - 1 / (8 * write_bw) (in single bdi case)
|
|
* or equally: x_intercept = bdi_setpoint + 8 * write_bw
|
|
*
|
|
* For single bdi case, the dirty pages are observed to fluctuate
|
|
* regularly within range
|
|
* [bdi_setpoint - write_bw/2, bdi_setpoint + write_bw/2]
|
|
* for various filesystems, where (2) can yield in a reasonable 12.5%
|
|
* fluctuation range for pos_ratio.
|
|
*
|
|
* For JBOD case, bdi_thresh (not bdi_dirty!) could fluctuate up to its
|
|
* own size, so move the slope over accordingly and choose a slope that
|
|
* yields 100% pos_ratio fluctuation on suddenly doubled bdi_thresh.
|
|
*/
|
|
if (unlikely(bdi_thresh > thresh))
|
|
bdi_thresh = thresh;
|
|
/*
|
|
* It's very possible that bdi_thresh is close to 0 not because the
|
|
* device is slow, but that it has remained inactive for long time.
|
|
* Honour such devices a reasonable good (hopefully IO efficient)
|
|
* threshold, so that the occasional writes won't be blocked and active
|
|
* writes can rampup the threshold quickly.
|
|
*/
|
|
bdi_thresh = max(bdi_thresh, (limit - dirty) / 8);
|
|
/*
|
|
* scale global setpoint to bdi's:
|
|
* bdi_setpoint = setpoint * bdi_thresh / thresh
|
|
*/
|
|
x = div_u64((u64)bdi_thresh << 16, thresh + 1);
|
|
bdi_setpoint = setpoint * (u64)x >> 16;
|
|
/*
|
|
* Use span=(8*write_bw) in single bdi case as indicated by
|
|
* (thresh - bdi_thresh ~= 0) and transit to bdi_thresh in JBOD case.
|
|
*
|
|
* bdi_thresh thresh - bdi_thresh
|
|
* span = ---------- * (8 * write_bw) + ------------------- * bdi_thresh
|
|
* thresh thresh
|
|
*/
|
|
span = (thresh - bdi_thresh + 8 * write_bw) * (u64)x >> 16;
|
|
x_intercept = bdi_setpoint + span;
|
|
|
|
if (bdi_dirty < x_intercept - span / 4) {
|
|
pos_ratio = div64_u64(pos_ratio * (x_intercept - bdi_dirty),
|
|
x_intercept - bdi_setpoint + 1);
|
|
} else
|
|
pos_ratio /= 4;
|
|
|
|
/*
|
|
* bdi reserve area, safeguard against dirty pool underrun and disk idle
|
|
* It may push the desired control point of global dirty pages higher
|
|
* than setpoint.
|
|
*/
|
|
x_intercept = bdi_thresh / 2;
|
|
if (bdi_dirty < x_intercept) {
|
|
if (bdi_dirty > x_intercept / 8)
|
|
pos_ratio = div_u64(pos_ratio * x_intercept, bdi_dirty);
|
|
else
|
|
pos_ratio *= 8;
|
|
}
|
|
|
|
return pos_ratio;
|
|
}
|
|
|
|
static void bdi_update_write_bandwidth(struct backing_dev_info *bdi,
|
|
unsigned long elapsed,
|
|
unsigned long written)
|
|
{
|
|
const unsigned long period = roundup_pow_of_two(3 * HZ);
|
|
unsigned long avg = bdi->avg_write_bandwidth;
|
|
unsigned long old = bdi->write_bandwidth;
|
|
u64 bw;
|
|
|
|
/*
|
|
* bw = written * HZ / elapsed
|
|
*
|
|
* bw * elapsed + write_bandwidth * (period - elapsed)
|
|
* write_bandwidth = ---------------------------------------------------
|
|
* period
|
|
*/
|
|
bw = written - bdi->written_stamp;
|
|
bw *= HZ;
|
|
if (unlikely(elapsed > period)) {
|
|
do_div(bw, elapsed);
|
|
avg = bw;
|
|
goto out;
|
|
}
|
|
bw += (u64)bdi->write_bandwidth * (period - elapsed);
|
|
bw >>= ilog2(period);
|
|
|
|
/*
|
|
* one more level of smoothing, for filtering out sudden spikes
|
|
*/
|
|
if (avg > old && old >= (unsigned long)bw)
|
|
avg -= (avg - old) >> 3;
|
|
|
|
if (avg < old && old <= (unsigned long)bw)
|
|
avg += (old - avg) >> 3;
|
|
|
|
out:
|
|
bdi->write_bandwidth = bw;
|
|
bdi->avg_write_bandwidth = avg;
|
|
}
|
|
|
|
/*
|
|
* The global dirtyable memory and dirty threshold could be suddenly knocked
|
|
* down by a large amount (eg. on the startup of KVM in a swapless system).
|
|
* This may throw the system into deep dirty exceeded state and throttle
|
|
* heavy/light dirtiers alike. To retain good responsiveness, maintain
|
|
* global_dirty_limit for tracking slowly down to the knocked down dirty
|
|
* threshold.
|
|
*/
|
|
static void update_dirty_limit(unsigned long thresh, unsigned long dirty)
|
|
{
|
|
unsigned long limit = global_dirty_limit;
|
|
|
|
/*
|
|
* Follow up in one step.
|
|
*/
|
|
if (limit < thresh) {
|
|
limit = thresh;
|
|
goto update;
|
|
}
|
|
|
|
/*
|
|
* Follow down slowly. Use the higher one as the target, because thresh
|
|
* may drop below dirty. This is exactly the reason to introduce
|
|
* global_dirty_limit which is guaranteed to lie above the dirty pages.
|
|
*/
|
|
thresh = max(thresh, dirty);
|
|
if (limit > thresh) {
|
|
limit -= (limit - thresh) >> 5;
|
|
goto update;
|
|
}
|
|
return;
|
|
update:
|
|
global_dirty_limit = limit;
|
|
}
|
|
|
|
static void global_update_bandwidth(unsigned long thresh,
|
|
unsigned long dirty,
|
|
unsigned long now)
|
|
{
|
|
static DEFINE_SPINLOCK(dirty_lock);
|
|
static unsigned long update_time;
|
|
|
|
/*
|
|
* check locklessly first to optimize away locking for the most time
|
|
*/
|
|
if (time_before(now, update_time + BANDWIDTH_INTERVAL))
|
|
return;
|
|
|
|
spin_lock(&dirty_lock);
|
|
if (time_after_eq(now, update_time + BANDWIDTH_INTERVAL)) {
|
|
update_dirty_limit(thresh, dirty);
|
|
update_time = now;
|
|
}
|
|
spin_unlock(&dirty_lock);
|
|
}
|
|
|
|
/*
|
|
* Maintain bdi->dirty_ratelimit, the base dirty throttle rate.
|
|
*
|
|
* Normal bdi tasks will be curbed at or below it in long term.
|
|
* Obviously it should be around (write_bw / N) when there are N dd tasks.
|
|
*/
|
|
static void bdi_update_dirty_ratelimit(struct backing_dev_info *bdi,
|
|
unsigned long thresh,
|
|
unsigned long bg_thresh,
|
|
unsigned long dirty,
|
|
unsigned long bdi_thresh,
|
|
unsigned long bdi_dirty,
|
|
unsigned long dirtied,
|
|
unsigned long elapsed)
|
|
{
|
|
unsigned long freerun = dirty_freerun_ceiling(thresh, bg_thresh);
|
|
unsigned long limit = hard_dirty_limit(thresh);
|
|
unsigned long setpoint = (freerun + limit) / 2;
|
|
unsigned long write_bw = bdi->avg_write_bandwidth;
|
|
unsigned long dirty_ratelimit = bdi->dirty_ratelimit;
|
|
unsigned long dirty_rate;
|
|
unsigned long task_ratelimit;
|
|
unsigned long balanced_dirty_ratelimit;
|
|
unsigned long pos_ratio;
|
|
unsigned long step;
|
|
unsigned long x;
|
|
|
|
/*
|
|
* The dirty rate will match the writeout rate in long term, except
|
|
* when dirty pages are truncated by userspace or re-dirtied by FS.
|
|
*/
|
|
dirty_rate = (dirtied - bdi->dirtied_stamp) * HZ / elapsed;
|
|
|
|
pos_ratio = bdi_position_ratio(bdi, thresh, bg_thresh, dirty,
|
|
bdi_thresh, bdi_dirty);
|
|
/*
|
|
* task_ratelimit reflects each dd's dirty rate for the past 200ms.
|
|
*/
|
|
task_ratelimit = (u64)dirty_ratelimit *
|
|
pos_ratio >> RATELIMIT_CALC_SHIFT;
|
|
task_ratelimit++; /* it helps rampup dirty_ratelimit from tiny values */
|
|
|
|
/*
|
|
* A linear estimation of the "balanced" throttle rate. The theory is,
|
|
* if there are N dd tasks, each throttled at task_ratelimit, the bdi's
|
|
* dirty_rate will be measured to be (N * task_ratelimit). So the below
|
|
* formula will yield the balanced rate limit (write_bw / N).
|
|
*
|
|
* Note that the expanded form is not a pure rate feedback:
|
|
* rate_(i+1) = rate_(i) * (write_bw / dirty_rate) (1)
|
|
* but also takes pos_ratio into account:
|
|
* rate_(i+1) = rate_(i) * (write_bw / dirty_rate) * pos_ratio (2)
|
|
*
|
|
* (1) is not realistic because pos_ratio also takes part in balancing
|
|
* the dirty rate. Consider the state
|
|
* pos_ratio = 0.5 (3)
|
|
* rate = 2 * (write_bw / N) (4)
|
|
* If (1) is used, it will stuck in that state! Because each dd will
|
|
* be throttled at
|
|
* task_ratelimit = pos_ratio * rate = (write_bw / N) (5)
|
|
* yielding
|
|
* dirty_rate = N * task_ratelimit = write_bw (6)
|
|
* put (6) into (1) we get
|
|
* rate_(i+1) = rate_(i) (7)
|
|
*
|
|
* So we end up using (2) to always keep
|
|
* rate_(i+1) ~= (write_bw / N) (8)
|
|
* regardless of the value of pos_ratio. As long as (8) is satisfied,
|
|
* pos_ratio is able to drive itself to 1.0, which is not only where
|
|
* the dirty count meet the setpoint, but also where the slope of
|
|
* pos_ratio is most flat and hence task_ratelimit is least fluctuated.
|
|
*/
|
|
balanced_dirty_ratelimit = div_u64((u64)task_ratelimit * write_bw,
|
|
dirty_rate | 1);
|
|
/*
|
|
* balanced_dirty_ratelimit ~= (write_bw / N) <= write_bw
|
|
*/
|
|
if (unlikely(balanced_dirty_ratelimit > write_bw))
|
|
balanced_dirty_ratelimit = write_bw;
|
|
|
|
/*
|
|
* We could safely do this and return immediately:
|
|
*
|
|
* bdi->dirty_ratelimit = balanced_dirty_ratelimit;
|
|
*
|
|
* However to get a more stable dirty_ratelimit, the below elaborated
|
|
* code makes use of task_ratelimit to filter out singular points and
|
|
* limit the step size.
|
|
*
|
|
* The below code essentially only uses the relative value of
|
|
*
|
|
* task_ratelimit - dirty_ratelimit
|
|
* = (pos_ratio - 1) * dirty_ratelimit
|
|
*
|
|
* which reflects the direction and size of dirty position error.
|
|
*/
|
|
|
|
/*
|
|
* dirty_ratelimit will follow balanced_dirty_ratelimit iff
|
|
* task_ratelimit is on the same side of dirty_ratelimit, too.
|
|
* For example, when
|
|
* - dirty_ratelimit > balanced_dirty_ratelimit
|
|
* - dirty_ratelimit > task_ratelimit (dirty pages are above setpoint)
|
|
* lowering dirty_ratelimit will help meet both the position and rate
|
|
* control targets. Otherwise, don't update dirty_ratelimit if it will
|
|
* only help meet the rate target. After all, what the users ultimately
|
|
* feel and care are stable dirty rate and small position error.
|
|
*
|
|
* |task_ratelimit - dirty_ratelimit| is used to limit the step size
|
|
* and filter out the singular points of balanced_dirty_ratelimit. Which
|
|
* keeps jumping around randomly and can even leap far away at times
|
|
* due to the small 200ms estimation period of dirty_rate (we want to
|
|
* keep that period small to reduce time lags).
|
|
*/
|
|
step = 0;
|
|
|
|
/*
|
|
* For strictlimit case, calculations above were based on bdi counters
|
|
* and limits (starting from pos_ratio = bdi_position_ratio() and up to
|
|
* balanced_dirty_ratelimit = task_ratelimit * write_bw / dirty_rate).
|
|
* Hence, to calculate "step" properly, we have to use bdi_dirty as
|
|
* "dirty" and bdi_setpoint as "setpoint".
|
|
*
|
|
* We rampup dirty_ratelimit forcibly if bdi_dirty is low because
|
|
* it's possible that bdi_thresh is close to zero due to inactivity
|
|
* of backing device (see the implementation of bdi_dirty_limit()).
|
|
*/
|
|
if (unlikely(bdi->capabilities & BDI_CAP_STRICTLIMIT)) {
|
|
dirty = bdi_dirty;
|
|
if (bdi_dirty < 8)
|
|
setpoint = bdi_dirty + 1;
|
|
else
|
|
setpoint = (bdi_thresh +
|
|
bdi_dirty_limit(bdi, bg_thresh)) / 2;
|
|
}
|
|
|
|
if (dirty < setpoint) {
|
|
x = min3(bdi->balanced_dirty_ratelimit,
|
|
balanced_dirty_ratelimit, task_ratelimit);
|
|
if (dirty_ratelimit < x)
|
|
step = x - dirty_ratelimit;
|
|
} else {
|
|
x = max3(bdi->balanced_dirty_ratelimit,
|
|
balanced_dirty_ratelimit, task_ratelimit);
|
|
if (dirty_ratelimit > x)
|
|
step = dirty_ratelimit - x;
|
|
}
|
|
|
|
/*
|
|
* Don't pursue 100% rate matching. It's impossible since the balanced
|
|
* rate itself is constantly fluctuating. So decrease the track speed
|
|
* when it gets close to the target. Helps eliminate pointless tremors.
|
|
*/
|
|
step >>= dirty_ratelimit / (2 * step + 1);
|
|
/*
|
|
* Limit the tracking speed to avoid overshooting.
|
|
*/
|
|
step = (step + 7) / 8;
|
|
|
|
if (dirty_ratelimit < balanced_dirty_ratelimit)
|
|
dirty_ratelimit += step;
|
|
else
|
|
dirty_ratelimit -= step;
|
|
|
|
bdi->dirty_ratelimit = max(dirty_ratelimit, 1UL);
|
|
bdi->balanced_dirty_ratelimit = balanced_dirty_ratelimit;
|
|
|
|
trace_bdi_dirty_ratelimit(bdi, dirty_rate, task_ratelimit);
|
|
}
|
|
|
|
void __bdi_update_bandwidth(struct backing_dev_info *bdi,
|
|
unsigned long thresh,
|
|
unsigned long bg_thresh,
|
|
unsigned long dirty,
|
|
unsigned long bdi_thresh,
|
|
unsigned long bdi_dirty,
|
|
unsigned long start_time)
|
|
{
|
|
unsigned long now = jiffies;
|
|
unsigned long elapsed = now - bdi->bw_time_stamp;
|
|
unsigned long dirtied;
|
|
unsigned long written;
|
|
|
|
/*
|
|
* rate-limit, only update once every 200ms.
|
|
*/
|
|
if (elapsed < BANDWIDTH_INTERVAL)
|
|
return;
|
|
|
|
dirtied = percpu_counter_read(&bdi->bdi_stat[BDI_DIRTIED]);
|
|
written = percpu_counter_read(&bdi->bdi_stat[BDI_WRITTEN]);
|
|
|
|
/*
|
|
* Skip quiet periods when disk bandwidth is under-utilized.
|
|
* (at least 1s idle time between two flusher runs)
|
|
*/
|
|
if (elapsed > HZ && time_before(bdi->bw_time_stamp, start_time))
|
|
goto snapshot;
|
|
|
|
if (thresh) {
|
|
global_update_bandwidth(thresh, dirty, now);
|
|
bdi_update_dirty_ratelimit(bdi, thresh, bg_thresh, dirty,
|
|
bdi_thresh, bdi_dirty,
|
|
dirtied, elapsed);
|
|
}
|
|
bdi_update_write_bandwidth(bdi, elapsed, written);
|
|
|
|
snapshot:
|
|
bdi->dirtied_stamp = dirtied;
|
|
bdi->written_stamp = written;
|
|
bdi->bw_time_stamp = now;
|
|
}
|
|
|
|
static void bdi_update_bandwidth(struct backing_dev_info *bdi,
|
|
unsigned long thresh,
|
|
unsigned long bg_thresh,
|
|
unsigned long dirty,
|
|
unsigned long bdi_thresh,
|
|
unsigned long bdi_dirty,
|
|
unsigned long start_time)
|
|
{
|
|
if (time_is_after_eq_jiffies(bdi->bw_time_stamp + BANDWIDTH_INTERVAL))
|
|
return;
|
|
spin_lock(&bdi->wb.list_lock);
|
|
__bdi_update_bandwidth(bdi, thresh, bg_thresh, dirty,
|
|
bdi_thresh, bdi_dirty, start_time);
|
|
spin_unlock(&bdi->wb.list_lock);
|
|
}
|
|
|
|
/*
|
|
* After a task dirtied this many pages, balance_dirty_pages_ratelimited()
|
|
* will look to see if it needs to start dirty throttling.
|
|
*
|
|
* If dirty_poll_interval is too low, big NUMA machines will call the expensive
|
|
* global_page_state() too often. So scale it near-sqrt to the safety margin
|
|
* (the number of pages we may dirty without exceeding the dirty limits).
|
|
*/
|
|
static unsigned long dirty_poll_interval(unsigned long dirty,
|
|
unsigned long thresh)
|
|
{
|
|
if (thresh > dirty)
|
|
return 1UL << (ilog2(thresh - dirty) >> 1);
|
|
|
|
return 1;
|
|
}
|
|
|
|
static unsigned long bdi_max_pause(struct backing_dev_info *bdi,
|
|
unsigned long bdi_dirty)
|
|
{
|
|
unsigned long bw = bdi->avg_write_bandwidth;
|
|
unsigned long t;
|
|
|
|
/*
|
|
* Limit pause time for small memory systems. If sleeping for too long
|
|
* time, a small pool of dirty/writeback pages may go empty and disk go
|
|
* idle.
|
|
*
|
|
* 8 serves as the safety ratio.
|
|
*/
|
|
t = bdi_dirty / (1 + bw / roundup_pow_of_two(1 + HZ / 8));
|
|
t++;
|
|
|
|
return min_t(unsigned long, t, MAX_PAUSE);
|
|
}
|
|
|
|
static long bdi_min_pause(struct backing_dev_info *bdi,
|
|
long max_pause,
|
|
unsigned long task_ratelimit,
|
|
unsigned long dirty_ratelimit,
|
|
int *nr_dirtied_pause)
|
|
{
|
|
long hi = ilog2(bdi->avg_write_bandwidth);
|
|
long lo = ilog2(bdi->dirty_ratelimit);
|
|
long t; /* target pause */
|
|
long pause; /* estimated next pause */
|
|
int pages; /* target nr_dirtied_pause */
|
|
|
|
/* target for 10ms pause on 1-dd case */
|
|
t = max(1, HZ / 100);
|
|
|
|
/*
|
|
* Scale up pause time for concurrent dirtiers in order to reduce CPU
|
|
* overheads.
|
|
*
|
|
* (N * 10ms) on 2^N concurrent tasks.
|
|
*/
|
|
if (hi > lo)
|
|
t += (hi - lo) * (10 * HZ) / 1024;
|
|
|
|
/*
|
|
* This is a bit convoluted. We try to base the next nr_dirtied_pause
|
|
* on the much more stable dirty_ratelimit. However the next pause time
|
|
* will be computed based on task_ratelimit and the two rate limits may
|
|
* depart considerably at some time. Especially if task_ratelimit goes
|
|
* below dirty_ratelimit/2 and the target pause is max_pause, the next
|
|
* pause time will be max_pause*2 _trimmed down_ to max_pause. As a
|
|
* result task_ratelimit won't be executed faithfully, which could
|
|
* eventually bring down dirty_ratelimit.
|
|
*
|
|
* We apply two rules to fix it up:
|
|
* 1) try to estimate the next pause time and if necessary, use a lower
|
|
* nr_dirtied_pause so as not to exceed max_pause. When this happens,
|
|
* nr_dirtied_pause will be "dancing" with task_ratelimit.
|
|
* 2) limit the target pause time to max_pause/2, so that the normal
|
|
* small fluctuations of task_ratelimit won't trigger rule (1) and
|
|
* nr_dirtied_pause will remain as stable as dirty_ratelimit.
|
|
*/
|
|
t = min(t, 1 + max_pause / 2);
|
|
pages = dirty_ratelimit * t / roundup_pow_of_two(HZ);
|
|
|
|
/*
|
|
* Tiny nr_dirtied_pause is found to hurt I/O performance in the test
|
|
* case fio-mmap-randwrite-64k, which does 16*{sync read, async write}.
|
|
* When the 16 consecutive reads are often interrupted by some dirty
|
|
* throttling pause during the async writes, cfq will go into idles
|
|
* (deadline is fine). So push nr_dirtied_pause as high as possible
|
|
* until reaches DIRTY_POLL_THRESH=32 pages.
|
|
*/
|
|
if (pages < DIRTY_POLL_THRESH) {
|
|
t = max_pause;
|
|
pages = dirty_ratelimit * t / roundup_pow_of_two(HZ);
|
|
if (pages > DIRTY_POLL_THRESH) {
|
|
pages = DIRTY_POLL_THRESH;
|
|
t = HZ * DIRTY_POLL_THRESH / dirty_ratelimit;
|
|
}
|
|
}
|
|
|
|
pause = HZ * pages / (task_ratelimit + 1);
|
|
if (pause > max_pause) {
|
|
t = max_pause;
|
|
pages = task_ratelimit * t / roundup_pow_of_two(HZ);
|
|
}
|
|
|
|
*nr_dirtied_pause = pages;
|
|
/*
|
|
* The minimal pause time will normally be half the target pause time.
|
|
*/
|
|
return pages >= DIRTY_POLL_THRESH ? 1 + t / 2 : t;
|
|
}
|
|
|
|
static inline void bdi_dirty_limits(struct backing_dev_info *bdi,
|
|
unsigned long dirty_thresh,
|
|
unsigned long background_thresh,
|
|
unsigned long *bdi_dirty,
|
|
unsigned long *bdi_thresh,
|
|
unsigned long *bdi_bg_thresh)
|
|
{
|
|
unsigned long bdi_reclaimable;
|
|
|
|
/*
|
|
* bdi_thresh is not treated as some limiting factor as
|
|
* dirty_thresh, due to reasons
|
|
* - in JBOD setup, bdi_thresh can fluctuate a lot
|
|
* - in a system with HDD and USB key, the USB key may somehow
|
|
* go into state (bdi_dirty >> bdi_thresh) either because
|
|
* bdi_dirty starts high, or because bdi_thresh drops low.
|
|
* In this case we don't want to hard throttle the USB key
|
|
* dirtiers for 100 seconds until bdi_dirty drops under
|
|
* bdi_thresh. Instead the auxiliary bdi control line in
|
|
* bdi_position_ratio() will let the dirtier task progress
|
|
* at some rate <= (write_bw / 2) for bringing down bdi_dirty.
|
|
*/
|
|
*bdi_thresh = bdi_dirty_limit(bdi, dirty_thresh);
|
|
|
|
if (bdi_bg_thresh)
|
|
*bdi_bg_thresh = dirty_thresh ? div_u64((u64)*bdi_thresh *
|
|
background_thresh,
|
|
dirty_thresh) : 0;
|
|
|
|
/*
|
|
* In order to avoid the stacked BDI deadlock we need
|
|
* to ensure we accurately count the 'dirty' pages when
|
|
* the threshold is low.
|
|
*
|
|
* Otherwise it would be possible to get thresh+n pages
|
|
* reported dirty, even though there are thresh-m pages
|
|
* actually dirty; with m+n sitting in the percpu
|
|
* deltas.
|
|
*/
|
|
if (*bdi_thresh < 2 * bdi_stat_error(bdi)) {
|
|
bdi_reclaimable = bdi_stat_sum(bdi, BDI_RECLAIMABLE);
|
|
*bdi_dirty = bdi_reclaimable +
|
|
bdi_stat_sum(bdi, BDI_WRITEBACK);
|
|
} else {
|
|
bdi_reclaimable = bdi_stat(bdi, BDI_RECLAIMABLE);
|
|
*bdi_dirty = bdi_reclaimable +
|
|
bdi_stat(bdi, BDI_WRITEBACK);
|
|
}
|
|
}
|
|
|
|
/*
|
|
* balance_dirty_pages() must be called by processes which are generating dirty
|
|
* data. It looks at the number of dirty pages in the machine and will force
|
|
* the caller to wait once crossing the (background_thresh + dirty_thresh) / 2.
|
|
* If we're over `background_thresh' then the writeback threads are woken to
|
|
* perform some writeout.
|
|
*/
|
|
static void balance_dirty_pages(struct address_space *mapping,
|
|
unsigned long pages_dirtied)
|
|
{
|
|
unsigned long nr_reclaimable; /* = file_dirty + unstable_nfs */
|
|
unsigned long nr_dirty; /* = file_dirty + writeback + unstable_nfs */
|
|
unsigned long background_thresh;
|
|
unsigned long dirty_thresh;
|
|
long period;
|
|
long pause;
|
|
long max_pause;
|
|
long min_pause;
|
|
int nr_dirtied_pause;
|
|
bool dirty_exceeded = false;
|
|
unsigned long task_ratelimit;
|
|
unsigned long dirty_ratelimit;
|
|
unsigned long pos_ratio;
|
|
struct backing_dev_info *bdi = mapping->backing_dev_info;
|
|
bool strictlimit = bdi->capabilities & BDI_CAP_STRICTLIMIT;
|
|
unsigned long start_time = jiffies;
|
|
|
|
for (;;) {
|
|
unsigned long now = jiffies;
|
|
unsigned long uninitialized_var(bdi_thresh);
|
|
unsigned long thresh;
|
|
unsigned long uninitialized_var(bdi_dirty);
|
|
unsigned long dirty;
|
|
unsigned long bg_thresh;
|
|
|
|
/*
|
|
* Unstable writes are a feature of certain networked
|
|
* filesystems (i.e. NFS) in which data may have been
|
|
* written to the server's write cache, but has not yet
|
|
* been flushed to permanent storage.
|
|
*/
|
|
nr_reclaimable = global_page_state(NR_FILE_DIRTY) +
|
|
global_page_state(NR_UNSTABLE_NFS);
|
|
nr_dirty = nr_reclaimable + global_page_state(NR_WRITEBACK);
|
|
|
|
global_dirty_limits(&background_thresh, &dirty_thresh);
|
|
|
|
if (unlikely(strictlimit)) {
|
|
bdi_dirty_limits(bdi, dirty_thresh, background_thresh,
|
|
&bdi_dirty, &bdi_thresh, &bg_thresh);
|
|
|
|
dirty = bdi_dirty;
|
|
thresh = bdi_thresh;
|
|
} else {
|
|
dirty = nr_dirty;
|
|
thresh = dirty_thresh;
|
|
bg_thresh = background_thresh;
|
|
}
|
|
|
|
/*
|
|
* Throttle it only when the background writeback cannot
|
|
* catch-up. This avoids (excessively) small writeouts
|
|
* when the bdi limits are ramping up in case of !strictlimit.
|
|
*
|
|
* In strictlimit case make decision based on the bdi counters
|
|
* and limits. Small writeouts when the bdi limits are ramping
|
|
* up are the price we consciously pay for strictlimit-ing.
|
|
*/
|
|
if (dirty <= dirty_freerun_ceiling(thresh, bg_thresh)) {
|
|
current->dirty_paused_when = now;
|
|
current->nr_dirtied = 0;
|
|
current->nr_dirtied_pause =
|
|
dirty_poll_interval(dirty, thresh);
|
|
break;
|
|
}
|
|
|
|
if (unlikely(!writeback_in_progress(bdi)))
|
|
bdi_start_background_writeback(bdi);
|
|
|
|
if (!strictlimit)
|
|
bdi_dirty_limits(bdi, dirty_thresh, background_thresh,
|
|
&bdi_dirty, &bdi_thresh, NULL);
|
|
|
|
dirty_exceeded = (bdi_dirty > bdi_thresh) &&
|
|
((nr_dirty > dirty_thresh) || strictlimit);
|
|
if (dirty_exceeded && !bdi->dirty_exceeded)
|
|
bdi->dirty_exceeded = 1;
|
|
|
|
bdi_update_bandwidth(bdi, dirty_thresh, background_thresh,
|
|
nr_dirty, bdi_thresh, bdi_dirty,
|
|
start_time);
|
|
|
|
dirty_ratelimit = bdi->dirty_ratelimit;
|
|
pos_ratio = bdi_position_ratio(bdi, dirty_thresh,
|
|
background_thresh, nr_dirty,
|
|
bdi_thresh, bdi_dirty);
|
|
task_ratelimit = ((u64)dirty_ratelimit * pos_ratio) >>
|
|
RATELIMIT_CALC_SHIFT;
|
|
max_pause = bdi_max_pause(bdi, bdi_dirty);
|
|
min_pause = bdi_min_pause(bdi, max_pause,
|
|
task_ratelimit, dirty_ratelimit,
|
|
&nr_dirtied_pause);
|
|
|
|
if (unlikely(task_ratelimit == 0)) {
|
|
period = max_pause;
|
|
pause = max_pause;
|
|
goto pause;
|
|
}
|
|
period = HZ * pages_dirtied / task_ratelimit;
|
|
pause = period;
|
|
if (current->dirty_paused_when)
|
|
pause -= now - current->dirty_paused_when;
|
|
/*
|
|
* For less than 1s think time (ext3/4 may block the dirtier
|
|
* for up to 800ms from time to time on 1-HDD; so does xfs,
|
|
* however at much less frequency), try to compensate it in
|
|
* future periods by updating the virtual time; otherwise just
|
|
* do a reset, as it may be a light dirtier.
|
|
*/
|
|
if (pause < min_pause) {
|
|
trace_balance_dirty_pages(bdi,
|
|
dirty_thresh,
|
|
background_thresh,
|
|
nr_dirty,
|
|
bdi_thresh,
|
|
bdi_dirty,
|
|
dirty_ratelimit,
|
|
task_ratelimit,
|
|
pages_dirtied,
|
|
period,
|
|
min(pause, 0L),
|
|
start_time);
|
|
if (pause < -HZ) {
|
|
current->dirty_paused_when = now;
|
|
current->nr_dirtied = 0;
|
|
} else if (period) {
|
|
current->dirty_paused_when += period;
|
|
current->nr_dirtied = 0;
|
|
} else if (current->nr_dirtied_pause <= pages_dirtied)
|
|
current->nr_dirtied_pause += pages_dirtied;
|
|
break;
|
|
}
|
|
if (unlikely(pause > max_pause)) {
|
|
/* for occasional dropped task_ratelimit */
|
|
now += min(pause - max_pause, max_pause);
|
|
pause = max_pause;
|
|
}
|
|
|
|
pause:
|
|
trace_balance_dirty_pages(bdi,
|
|
dirty_thresh,
|
|
background_thresh,
|
|
nr_dirty,
|
|
bdi_thresh,
|
|
bdi_dirty,
|
|
dirty_ratelimit,
|
|
task_ratelimit,
|
|
pages_dirtied,
|
|
period,
|
|
pause,
|
|
start_time);
|
|
__set_current_state(TASK_KILLABLE);
|
|
io_schedule_timeout(pause);
|
|
|
|
current->dirty_paused_when = now + pause;
|
|
current->nr_dirtied = 0;
|
|
current->nr_dirtied_pause = nr_dirtied_pause;
|
|
|
|
/*
|
|
* This is typically equal to (nr_dirty < dirty_thresh) and can
|
|
* also keep "1000+ dd on a slow USB stick" under control.
|
|
*/
|
|
if (task_ratelimit)
|
|
break;
|
|
|
|
/*
|
|
* In the case of an unresponding NFS server and the NFS dirty
|
|
* pages exceeds dirty_thresh, give the other good bdi's a pipe
|
|
* to go through, so that tasks on them still remain responsive.
|
|
*
|
|
* In theory 1 page is enough to keep the comsumer-producer
|
|
* pipe going: the flusher cleans 1 page => the task dirties 1
|
|
* more page. However bdi_dirty has accounting errors. So use
|
|
* the larger and more IO friendly bdi_stat_error.
|
|
*/
|
|
if (bdi_dirty <= bdi_stat_error(bdi))
|
|
break;
|
|
|
|
if (fatal_signal_pending(current))
|
|
break;
|
|
}
|
|
|
|
if (!dirty_exceeded && bdi->dirty_exceeded)
|
|
bdi->dirty_exceeded = 0;
|
|
|
|
if (writeback_in_progress(bdi))
|
|
return;
|
|
|
|
/*
|
|
* In laptop mode, we wait until hitting the higher threshold before
|
|
* starting background writeout, and then write out all the way down
|
|
* to the lower threshold. So slow writers cause minimal disk activity.
|
|
*
|
|
* In normal mode, we start background writeout at the lower
|
|
* background_thresh, to keep the amount of dirty memory low.
|
|
*/
|
|
if (laptop_mode)
|
|
return;
|
|
|
|
if (nr_reclaimable > background_thresh)
|
|
bdi_start_background_writeback(bdi);
|
|
}
|
|
|
|
void set_page_dirty_balance(struct page *page)
|
|
{
|
|
if (set_page_dirty(page)) {
|
|
struct address_space *mapping = page_mapping(page);
|
|
|
|
if (mapping)
|
|
balance_dirty_pages_ratelimited(mapping);
|
|
}
|
|
}
|
|
|
|
static DEFINE_PER_CPU(int, bdp_ratelimits);
|
|
|
|
/*
|
|
* Normal tasks are throttled by
|
|
* loop {
|
|
* dirty tsk->nr_dirtied_pause pages;
|
|
* take a snap in balance_dirty_pages();
|
|
* }
|
|
* However there is a worst case. If every task exit immediately when dirtied
|
|
* (tsk->nr_dirtied_pause - 1) pages, balance_dirty_pages() will never be
|
|
* called to throttle the page dirties. The solution is to save the not yet
|
|
* throttled page dirties in dirty_throttle_leaks on task exit and charge them
|
|
* randomly into the running tasks. This works well for the above worst case,
|
|
* as the new task will pick up and accumulate the old task's leaked dirty
|
|
* count and eventually get throttled.
|
|
*/
|
|
DEFINE_PER_CPU(int, dirty_throttle_leaks) = 0;
|
|
|
|
/**
|
|
* balance_dirty_pages_ratelimited - balance dirty memory state
|
|
* @mapping: address_space which was dirtied
|
|
*
|
|
* Processes which are dirtying memory should call in here once for each page
|
|
* which was newly dirtied. The function will periodically check the system's
|
|
* dirty state and will initiate writeback if needed.
|
|
*
|
|
* On really big machines, get_writeback_state is expensive, so try to avoid
|
|
* calling it too often (ratelimiting). But once we're over the dirty memory
|
|
* limit we decrease the ratelimiting by a lot, to prevent individual processes
|
|
* from overshooting the limit by (ratelimit_pages) each.
|
|
*/
|
|
void balance_dirty_pages_ratelimited(struct address_space *mapping)
|
|
{
|
|
struct backing_dev_info *bdi = mapping->backing_dev_info;
|
|
int ratelimit;
|
|
int *p;
|
|
|
|
if (!bdi_cap_account_dirty(bdi))
|
|
return;
|
|
|
|
ratelimit = current->nr_dirtied_pause;
|
|
if (bdi->dirty_exceeded)
|
|
ratelimit = min(ratelimit, 32 >> (PAGE_SHIFT - 10));
|
|
|
|
preempt_disable();
|
|
/*
|
|
* This prevents one CPU to accumulate too many dirtied pages without
|
|
* calling into balance_dirty_pages(), which can happen when there are
|
|
* 1000+ tasks, all of them start dirtying pages at exactly the same
|
|
* time, hence all honoured too large initial task->nr_dirtied_pause.
|
|
*/
|
|
p = this_cpu_ptr(&bdp_ratelimits);
|
|
if (unlikely(current->nr_dirtied >= ratelimit))
|
|
*p = 0;
|
|
else if (unlikely(*p >= ratelimit_pages)) {
|
|
*p = 0;
|
|
ratelimit = 0;
|
|
}
|
|
/*
|
|
* Pick up the dirtied pages by the exited tasks. This avoids lots of
|
|
* short-lived tasks (eg. gcc invocations in a kernel build) escaping
|
|
* the dirty throttling and livelock other long-run dirtiers.
|
|
*/
|
|
p = this_cpu_ptr(&dirty_throttle_leaks);
|
|
if (*p > 0 && current->nr_dirtied < ratelimit) {
|
|
unsigned long nr_pages_dirtied;
|
|
nr_pages_dirtied = min(*p, ratelimit - current->nr_dirtied);
|
|
*p -= nr_pages_dirtied;
|
|
current->nr_dirtied += nr_pages_dirtied;
|
|
}
|
|
preempt_enable();
|
|
|
|
if (unlikely(current->nr_dirtied >= ratelimit))
|
|
balance_dirty_pages(mapping, current->nr_dirtied);
|
|
}
|
|
EXPORT_SYMBOL(balance_dirty_pages_ratelimited);
|
|
|
|
void throttle_vm_writeout(gfp_t gfp_mask)
|
|
{
|
|
unsigned long background_thresh;
|
|
unsigned long dirty_thresh;
|
|
|
|
for ( ; ; ) {
|
|
global_dirty_limits(&background_thresh, &dirty_thresh);
|
|
dirty_thresh = hard_dirty_limit(dirty_thresh);
|
|
|
|
/*
|
|
* Boost the allowable dirty threshold a bit for page
|
|
* allocators so they don't get DoS'ed by heavy writers
|
|
*/
|
|
dirty_thresh += dirty_thresh / 10; /* wheeee... */
|
|
|
|
if (global_page_state(NR_UNSTABLE_NFS) +
|
|
global_page_state(NR_WRITEBACK) <= dirty_thresh)
|
|
break;
|
|
congestion_wait(BLK_RW_ASYNC, HZ/10);
|
|
|
|
/*
|
|
* The caller might hold locks which can prevent IO completion
|
|
* or progress in the filesystem. So we cannot just sit here
|
|
* waiting for IO to complete.
|
|
*/
|
|
if ((gfp_mask & (__GFP_FS|__GFP_IO)) != (__GFP_FS|__GFP_IO))
|
|
break;
|
|
}
|
|
}
|
|
|
|
/*
|
|
* sysctl handler for /proc/sys/vm/dirty_writeback_centisecs
|
|
*/
|
|
int dirty_writeback_centisecs_handler(struct ctl_table *table, int write,
|
|
void __user *buffer, size_t *length, loff_t *ppos)
|
|
{
|
|
proc_dointvec(table, write, buffer, length, ppos);
|
|
return 0;
|
|
}
|
|
|
|
#ifdef CONFIG_BLOCK
|
|
void laptop_mode_timer_fn(unsigned long data)
|
|
{
|
|
struct request_queue *q = (struct request_queue *)data;
|
|
int nr_pages = global_page_state(NR_FILE_DIRTY) +
|
|
global_page_state(NR_UNSTABLE_NFS);
|
|
|
|
/*
|
|
* We want to write everything out, not just down to the dirty
|
|
* threshold
|
|
*/
|
|
if (bdi_has_dirty_io(&q->backing_dev_info))
|
|
bdi_start_writeback(&q->backing_dev_info, nr_pages,
|
|
WB_REASON_LAPTOP_TIMER);
|
|
}
|
|
|
|
/*
|
|
* We've spun up the disk and we're in laptop mode: schedule writeback
|
|
* of all dirty data a few seconds from now. If the flush is already scheduled
|
|
* then push it back - the user is still using the disk.
|
|
*/
|
|
void laptop_io_completion(struct backing_dev_info *info)
|
|
{
|
|
mod_timer(&info->laptop_mode_wb_timer, jiffies + laptop_mode);
|
|
}
|
|
|
|
/*
|
|
* We're in laptop mode and we've just synced. The sync's writes will have
|
|
* caused another writeback to be scheduled by laptop_io_completion.
|
|
* Nothing needs to be written back anymore, so we unschedule the writeback.
|
|
*/
|
|
void laptop_sync_completion(void)
|
|
{
|
|
struct backing_dev_info *bdi;
|
|
|
|
rcu_read_lock();
|
|
|
|
list_for_each_entry_rcu(bdi, &bdi_list, bdi_list)
|
|
del_timer(&bdi->laptop_mode_wb_timer);
|
|
|
|
rcu_read_unlock();
|
|
}
|
|
#endif
|
|
|
|
/*
|
|
* If ratelimit_pages is too high then we can get into dirty-data overload
|
|
* if a large number of processes all perform writes at the same time.
|
|
* If it is too low then SMP machines will call the (expensive)
|
|
* get_writeback_state too often.
|
|
*
|
|
* Here we set ratelimit_pages to a level which ensures that when all CPUs are
|
|
* dirtying in parallel, we cannot go more than 3% (1/32) over the dirty memory
|
|
* thresholds.
|
|
*/
|
|
|
|
void writeback_set_ratelimit(void)
|
|
{
|
|
unsigned long background_thresh;
|
|
unsigned long dirty_thresh;
|
|
global_dirty_limits(&background_thresh, &dirty_thresh);
|
|
global_dirty_limit = dirty_thresh;
|
|
ratelimit_pages = dirty_thresh / (num_online_cpus() * 32);
|
|
if (ratelimit_pages < 16)
|
|
ratelimit_pages = 16;
|
|
}
|
|
|
|
static int
|
|
ratelimit_handler(struct notifier_block *self, unsigned long action,
|
|
void *hcpu)
|
|
{
|
|
|
|
switch (action & ~CPU_TASKS_FROZEN) {
|
|
case CPU_ONLINE:
|
|
case CPU_DEAD:
|
|
writeback_set_ratelimit();
|
|
return NOTIFY_OK;
|
|
default:
|
|
return NOTIFY_DONE;
|
|
}
|
|
}
|
|
|
|
static struct notifier_block ratelimit_nb = {
|
|
.notifier_call = ratelimit_handler,
|
|
.next = NULL,
|
|
};
|
|
|
|
/*
|
|
* Called early on to tune the page writeback dirty limits.
|
|
*
|
|
* We used to scale dirty pages according to how total memory
|
|
* related to pages that could be allocated for buffers (by
|
|
* comparing nr_free_buffer_pages() to vm_total_pages.
|
|
*
|
|
* However, that was when we used "dirty_ratio" to scale with
|
|
* all memory, and we don't do that any more. "dirty_ratio"
|
|
* is now applied to total non-HIGHPAGE memory (by subtracting
|
|
* totalhigh_pages from vm_total_pages), and as such we can't
|
|
* get into the old insane situation any more where we had
|
|
* large amounts of dirty pages compared to a small amount of
|
|
* non-HIGHMEM memory.
|
|
*
|
|
* But we might still want to scale the dirty_ratio by how
|
|
* much memory the box has..
|
|
*/
|
|
void __init page_writeback_init(void)
|
|
{
|
|
writeback_set_ratelimit();
|
|
register_cpu_notifier(&ratelimit_nb);
|
|
|
|
fprop_global_init(&writeout_completions, GFP_KERNEL);
|
|
}
|
|
|
|
/**
|
|
* tag_pages_for_writeback - tag pages to be written by write_cache_pages
|
|
* @mapping: address space structure to write
|
|
* @start: starting page index
|
|
* @end: ending page index (inclusive)
|
|
*
|
|
* This function scans the page range from @start to @end (inclusive) and tags
|
|
* all pages that have DIRTY tag set with a special TOWRITE tag. The idea is
|
|
* that write_cache_pages (or whoever calls this function) will then use
|
|
* TOWRITE tag to identify pages eligible for writeback. This mechanism is
|
|
* used to avoid livelocking of writeback by a process steadily creating new
|
|
* dirty pages in the file (thus it is important for this function to be quick
|
|
* so that it can tag pages faster than a dirtying process can create them).
|
|
*/
|
|
/*
|
|
* We tag pages in batches of WRITEBACK_TAG_BATCH to reduce tree_lock latency.
|
|
*/
|
|
void tag_pages_for_writeback(struct address_space *mapping,
|
|
pgoff_t start, pgoff_t end)
|
|
{
|
|
#define WRITEBACK_TAG_BATCH 4096
|
|
unsigned long tagged;
|
|
|
|
do {
|
|
spin_lock_irq(&mapping->tree_lock);
|
|
tagged = radix_tree_range_tag_if_tagged(&mapping->page_tree,
|
|
&start, end, WRITEBACK_TAG_BATCH,
|
|
PAGECACHE_TAG_DIRTY, PAGECACHE_TAG_TOWRITE);
|
|
spin_unlock_irq(&mapping->tree_lock);
|
|
WARN_ON_ONCE(tagged > WRITEBACK_TAG_BATCH);
|
|
cond_resched();
|
|
/* We check 'start' to handle wrapping when end == ~0UL */
|
|
} while (tagged >= WRITEBACK_TAG_BATCH && start);
|
|
}
|
|
EXPORT_SYMBOL(tag_pages_for_writeback);
|
|
|
|
/**
|
|
* write_cache_pages - walk the list of dirty pages of the given address space and write all of them.
|
|
* @mapping: address space structure to write
|
|
* @wbc: subtract the number of written pages from *@wbc->nr_to_write
|
|
* @writepage: function called for each page
|
|
* @data: data passed to writepage function
|
|
*
|
|
* If a page is already under I/O, write_cache_pages() skips it, even
|
|
* if it's dirty. This is desirable behaviour for memory-cleaning writeback,
|
|
* but it is INCORRECT for data-integrity system calls such as fsync(). fsync()
|
|
* and msync() need to guarantee that all the data which was dirty at the time
|
|
* the call was made get new I/O started against them. If wbc->sync_mode is
|
|
* WB_SYNC_ALL then we were called for data integrity and we must wait for
|
|
* existing IO to complete.
|
|
*
|
|
* To avoid livelocks (when other process dirties new pages), we first tag
|
|
* pages which should be written back with TOWRITE tag and only then start
|
|
* writing them. For data-integrity sync we have to be careful so that we do
|
|
* not miss some pages (e.g., because some other process has cleared TOWRITE
|
|
* tag we set). The rule we follow is that TOWRITE tag can be cleared only
|
|
* by the process clearing the DIRTY tag (and submitting the page for IO).
|
|
*/
|
|
int write_cache_pages(struct address_space *mapping,
|
|
struct writeback_control *wbc, writepage_t writepage,
|
|
void *data)
|
|
{
|
|
int ret = 0;
|
|
int done = 0;
|
|
struct pagevec pvec;
|
|
int nr_pages;
|
|
pgoff_t uninitialized_var(writeback_index);
|
|
pgoff_t index;
|
|
pgoff_t end; /* Inclusive */
|
|
pgoff_t done_index;
|
|
int cycled;
|
|
int range_whole = 0;
|
|
int tag;
|
|
|
|
pagevec_init(&pvec, 0);
|
|
if (wbc->range_cyclic) {
|
|
writeback_index = mapping->writeback_index; /* prev offset */
|
|
index = writeback_index;
|
|
if (index == 0)
|
|
cycled = 1;
|
|
else
|
|
cycled = 0;
|
|
end = -1;
|
|
} else {
|
|
index = wbc->range_start >> PAGE_CACHE_SHIFT;
|
|
end = wbc->range_end >> PAGE_CACHE_SHIFT;
|
|
if (wbc->range_start == 0 && wbc->range_end == LLONG_MAX)
|
|
range_whole = 1;
|
|
cycled = 1; /* ignore range_cyclic tests */
|
|
}
|
|
if (wbc->sync_mode == WB_SYNC_ALL || wbc->tagged_writepages)
|
|
tag = PAGECACHE_TAG_TOWRITE;
|
|
else
|
|
tag = PAGECACHE_TAG_DIRTY;
|
|
retry:
|
|
if (wbc->sync_mode == WB_SYNC_ALL || wbc->tagged_writepages)
|
|
tag_pages_for_writeback(mapping, index, end);
|
|
done_index = index;
|
|
while (!done && (index <= end)) {
|
|
int i;
|
|
|
|
nr_pages = pagevec_lookup_tag(&pvec, mapping, &index, tag,
|
|
min(end - index, (pgoff_t)PAGEVEC_SIZE-1) + 1);
|
|
if (nr_pages == 0)
|
|
break;
|
|
|
|
for (i = 0; i < nr_pages; i++) {
|
|
struct page *page = pvec.pages[i];
|
|
|
|
/*
|
|
* At this point, the page may be truncated or
|
|
* invalidated (changing page->mapping to NULL), or
|
|
* even swizzled back from swapper_space to tmpfs file
|
|
* mapping. However, page->index will not change
|
|
* because we have a reference on the page.
|
|
*/
|
|
if (page->index > end) {
|
|
/*
|
|
* can't be range_cyclic (1st pass) because
|
|
* end == -1 in that case.
|
|
*/
|
|
done = 1;
|
|
break;
|
|
}
|
|
|
|
done_index = page->index;
|
|
|
|
lock_page(page);
|
|
|
|
/*
|
|
* Page truncated or invalidated. We can freely skip it
|
|
* then, even for data integrity operations: the page
|
|
* has disappeared concurrently, so there could be no
|
|
* real expectation of this data interity operation
|
|
* even if there is now a new, dirty page at the same
|
|
* pagecache address.
|
|
*/
|
|
if (unlikely(page->mapping != mapping)) {
|
|
continue_unlock:
|
|
unlock_page(page);
|
|
continue;
|
|
}
|
|
|
|
if (!PageDirty(page)) {
|
|
/* someone wrote it for us */
|
|
goto continue_unlock;
|
|
}
|
|
|
|
if (PageWriteback(page)) {
|
|
if (wbc->sync_mode != WB_SYNC_NONE)
|
|
wait_on_page_writeback(page);
|
|
else
|
|
goto continue_unlock;
|
|
}
|
|
|
|
BUG_ON(PageWriteback(page));
|
|
if (!clear_page_dirty_for_io(page))
|
|
goto continue_unlock;
|
|
|
|
trace_wbc_writepage(wbc, mapping->backing_dev_info);
|
|
ret = (*writepage)(page, wbc, data);
|
|
if (unlikely(ret)) {
|
|
if (ret == AOP_WRITEPAGE_ACTIVATE) {
|
|
unlock_page(page);
|
|
ret = 0;
|
|
} else {
|
|
/*
|
|
* done_index is set past this page,
|
|
* so media errors will not choke
|
|
* background writeout for the entire
|
|
* file. This has consequences for
|
|
* range_cyclic semantics (ie. it may
|
|
* not be suitable for data integrity
|
|
* writeout).
|
|
*/
|
|
done_index = page->index + 1;
|
|
done = 1;
|
|
break;
|
|
}
|
|
}
|
|
|
|
/*
|
|
* We stop writing back only if we are not doing
|
|
* integrity sync. In case of integrity sync we have to
|
|
* keep going until we have written all the pages
|
|
* we tagged for writeback prior to entering this loop.
|
|
*/
|
|
if (--wbc->nr_to_write <= 0 &&
|
|
wbc->sync_mode == WB_SYNC_NONE) {
|
|
done = 1;
|
|
break;
|
|
}
|
|
}
|
|
pagevec_release(&pvec);
|
|
cond_resched();
|
|
}
|
|
if (!cycled && !done) {
|
|
/*
|
|
* range_cyclic:
|
|
* We hit the last page and there is more work to be done: wrap
|
|
* back to the start of the file
|
|
*/
|
|
cycled = 1;
|
|
index = 0;
|
|
end = writeback_index - 1;
|
|
goto retry;
|
|
}
|
|
if (wbc->range_cyclic || (range_whole && wbc->nr_to_write > 0))
|
|
mapping->writeback_index = done_index;
|
|
|
|
return ret;
|
|
}
|
|
EXPORT_SYMBOL(write_cache_pages);
|
|
|
|
/*
|
|
* Function used by generic_writepages to call the real writepage
|
|
* function and set the mapping flags on error
|
|
*/
|
|
static int __writepage(struct page *page, struct writeback_control *wbc,
|
|
void *data)
|
|
{
|
|
struct address_space *mapping = data;
|
|
int ret = mapping->a_ops->writepage(page, wbc);
|
|
mapping_set_error(mapping, ret);
|
|
return ret;
|
|
}
|
|
|
|
/**
|
|
* generic_writepages - walk the list of dirty pages of the given address space and writepage() all of them.
|
|
* @mapping: address space structure to write
|
|
* @wbc: subtract the number of written pages from *@wbc->nr_to_write
|
|
*
|
|
* This is a library function, which implements the writepages()
|
|
* address_space_operation.
|
|
*/
|
|
int generic_writepages(struct address_space *mapping,
|
|
struct writeback_control *wbc)
|
|
{
|
|
struct blk_plug plug;
|
|
int ret;
|
|
|
|
/* deal with chardevs and other special file */
|
|
if (!mapping->a_ops->writepage)
|
|
return 0;
|
|
|
|
blk_start_plug(&plug);
|
|
ret = write_cache_pages(mapping, wbc, __writepage, mapping);
|
|
blk_finish_plug(&plug);
|
|
return ret;
|
|
}
|
|
|
|
EXPORT_SYMBOL(generic_writepages);
|
|
|
|
int do_writepages(struct address_space *mapping, struct writeback_control *wbc)
|
|
{
|
|
int ret;
|
|
|
|
if (wbc->nr_to_write <= 0)
|
|
return 0;
|
|
if (mapping->a_ops->writepages)
|
|
ret = mapping->a_ops->writepages(mapping, wbc);
|
|
else
|
|
ret = generic_writepages(mapping, wbc);
|
|
return ret;
|
|
}
|
|
|
|
/**
|
|
* write_one_page - write out a single page and optionally wait on I/O
|
|
* @page: the page to write
|
|
* @wait: if true, wait on writeout
|
|
*
|
|
* The page must be locked by the caller and will be unlocked upon return.
|
|
*
|
|
* write_one_page() returns a negative error code if I/O failed.
|
|
*/
|
|
int write_one_page(struct page *page, int wait)
|
|
{
|
|
struct address_space *mapping = page->mapping;
|
|
int ret = 0;
|
|
struct writeback_control wbc = {
|
|
.sync_mode = WB_SYNC_ALL,
|
|
.nr_to_write = 1,
|
|
};
|
|
|
|
BUG_ON(!PageLocked(page));
|
|
|
|
if (wait)
|
|
wait_on_page_writeback(page);
|
|
|
|
if (clear_page_dirty_for_io(page)) {
|
|
page_cache_get(page);
|
|
ret = mapping->a_ops->writepage(page, &wbc);
|
|
if (ret == 0 && wait) {
|
|
wait_on_page_writeback(page);
|
|
if (PageError(page))
|
|
ret = -EIO;
|
|
}
|
|
page_cache_release(page);
|
|
} else {
|
|
unlock_page(page);
|
|
}
|
|
return ret;
|
|
}
|
|
EXPORT_SYMBOL(write_one_page);
|
|
|
|
/*
|
|
* For address_spaces which do not use buffers nor write back.
|
|
*/
|
|
int __set_page_dirty_no_writeback(struct page *page)
|
|
{
|
|
if (!PageDirty(page))
|
|
return !TestSetPageDirty(page);
|
|
return 0;
|
|
}
|
|
|
|
/*
|
|
* Helper function for set_page_dirty family.
|
|
* NOTE: This relies on being atomic wrt interrupts.
|
|
*/
|
|
void account_page_dirtied(struct page *page, struct address_space *mapping)
|
|
{
|
|
trace_writeback_dirty_page(page, mapping);
|
|
|
|
if (mapping_cap_account_dirty(mapping)) {
|
|
__inc_zone_page_state(page, NR_FILE_DIRTY);
|
|
__inc_zone_page_state(page, NR_DIRTIED);
|
|
__inc_bdi_stat(mapping->backing_dev_info, BDI_RECLAIMABLE);
|
|
__inc_bdi_stat(mapping->backing_dev_info, BDI_DIRTIED);
|
|
task_io_account_write(PAGE_CACHE_SIZE);
|
|
current->nr_dirtied++;
|
|
this_cpu_inc(bdp_ratelimits);
|
|
}
|
|
}
|
|
EXPORT_SYMBOL(account_page_dirtied);
|
|
|
|
/*
|
|
* Helper function for set_page_writeback family.
|
|
*
|
|
* The caller must hold mem_cgroup_begin/end_update_page_stat() lock
|
|
* while calling this function.
|
|
* See test_set_page_writeback for example.
|
|
*
|
|
* NOTE: Unlike account_page_dirtied this does not rely on being atomic
|
|
* wrt interrupts.
|
|
*/
|
|
void account_page_writeback(struct page *page)
|
|
{
|
|
mem_cgroup_inc_page_stat(page, MEM_CGROUP_STAT_WRITEBACK);
|
|
inc_zone_page_state(page, NR_WRITEBACK);
|
|
}
|
|
EXPORT_SYMBOL(account_page_writeback);
|
|
|
|
/*
|
|
* For address_spaces which do not use buffers. Just tag the page as dirty in
|
|
* its radix tree.
|
|
*
|
|
* This is also used when a single buffer is being dirtied: we want to set the
|
|
* page dirty in that case, but not all the buffers. This is a "bottom-up"
|
|
* dirtying, whereas __set_page_dirty_buffers() is a "top-down" dirtying.
|
|
*
|
|
* Most callers have locked the page, which pins the address_space in memory.
|
|
* But zap_pte_range() does not lock the page, however in that case the
|
|
* mapping is pinned by the vma's ->vm_file reference.
|
|
*
|
|
* We take care to handle the case where the page was truncated from the
|
|
* mapping by re-checking page_mapping() inside tree_lock.
|
|
*/
|
|
int __set_page_dirty_nobuffers(struct page *page)
|
|
{
|
|
if (!TestSetPageDirty(page)) {
|
|
struct address_space *mapping = page_mapping(page);
|
|
struct address_space *mapping2;
|
|
unsigned long flags;
|
|
|
|
if (!mapping)
|
|
return 1;
|
|
|
|
spin_lock_irqsave(&mapping->tree_lock, flags);
|
|
mapping2 = page_mapping(page);
|
|
if (mapping2) { /* Race with truncate? */
|
|
BUG_ON(mapping2 != mapping);
|
|
WARN_ON_ONCE(!PagePrivate(page) && !PageUptodate(page));
|
|
account_page_dirtied(page, mapping);
|
|
radix_tree_tag_set(&mapping->page_tree,
|
|
page_index(page), PAGECACHE_TAG_DIRTY);
|
|
}
|
|
spin_unlock_irqrestore(&mapping->tree_lock, flags);
|
|
if (mapping->host) {
|
|
/* !PageAnon && !swapper_space */
|
|
__mark_inode_dirty(mapping->host, I_DIRTY_PAGES);
|
|
}
|
|
return 1;
|
|
}
|
|
return 0;
|
|
}
|
|
EXPORT_SYMBOL(__set_page_dirty_nobuffers);
|
|
|
|
/*
|
|
* Call this whenever redirtying a page, to de-account the dirty counters
|
|
* (NR_DIRTIED, BDI_DIRTIED, tsk->nr_dirtied), so that they match the written
|
|
* counters (NR_WRITTEN, BDI_WRITTEN) in long term. The mismatches will lead to
|
|
* systematic errors in balanced_dirty_ratelimit and the dirty pages position
|
|
* control.
|
|
*/
|
|
void account_page_redirty(struct page *page)
|
|
{
|
|
struct address_space *mapping = page->mapping;
|
|
if (mapping && mapping_cap_account_dirty(mapping)) {
|
|
current->nr_dirtied--;
|
|
dec_zone_page_state(page, NR_DIRTIED);
|
|
dec_bdi_stat(mapping->backing_dev_info, BDI_DIRTIED);
|
|
}
|
|
}
|
|
EXPORT_SYMBOL(account_page_redirty);
|
|
|
|
/*
|
|
* When a writepage implementation decides that it doesn't want to write this
|
|
* page for some reason, it should redirty the locked page via
|
|
* redirty_page_for_writepage() and it should then unlock the page and return 0
|
|
*/
|
|
int redirty_page_for_writepage(struct writeback_control *wbc, struct page *page)
|
|
{
|
|
wbc->pages_skipped++;
|
|
account_page_redirty(page);
|
|
return __set_page_dirty_nobuffers(page);
|
|
}
|
|
EXPORT_SYMBOL(redirty_page_for_writepage);
|
|
|
|
/*
|
|
* Dirty a page.
|
|
*
|
|
* For pages with a mapping this should be done under the page lock
|
|
* for the benefit of asynchronous memory errors who prefer a consistent
|
|
* dirty state. This rule can be broken in some special cases,
|
|
* but should be better not to.
|
|
*
|
|
* If the mapping doesn't provide a set_page_dirty a_op, then
|
|
* just fall through and assume that it wants buffer_heads.
|
|
*/
|
|
int set_page_dirty(struct page *page)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
|
|
if (likely(mapping)) {
|
|
int (*spd)(struct page *) = mapping->a_ops->set_page_dirty;
|
|
/*
|
|
* readahead/lru_deactivate_page could remain
|
|
* PG_readahead/PG_reclaim due to race with end_page_writeback
|
|
* About readahead, if the page is written, the flags would be
|
|
* reset. So no problem.
|
|
* About lru_deactivate_page, if the page is redirty, the flag
|
|
* will be reset. So no problem. but if the page is used by readahead
|
|
* it will confuse readahead and make it restart the size rampup
|
|
* process. But it's a trivial problem.
|
|
*/
|
|
ClearPageReclaim(page);
|
|
#ifdef CONFIG_BLOCK
|
|
if (!spd)
|
|
spd = __set_page_dirty_buffers;
|
|
#endif
|
|
return (*spd)(page);
|
|
}
|
|
if (!PageDirty(page)) {
|
|
if (!TestSetPageDirty(page))
|
|
return 1;
|
|
}
|
|
return 0;
|
|
}
|
|
EXPORT_SYMBOL(set_page_dirty);
|
|
|
|
/*
|
|
* set_page_dirty() is racy if the caller has no reference against
|
|
* page->mapping->host, and if the page is unlocked. This is because another
|
|
* CPU could truncate the page off the mapping and then free the mapping.
|
|
*
|
|
* Usually, the page _is_ locked, or the caller is a user-space process which
|
|
* holds a reference on the inode by having an open file.
|
|
*
|
|
* In other cases, the page should be locked before running set_page_dirty().
|
|
*/
|
|
int set_page_dirty_lock(struct page *page)
|
|
{
|
|
int ret;
|
|
|
|
lock_page(page);
|
|
ret = set_page_dirty(page);
|
|
unlock_page(page);
|
|
return ret;
|
|
}
|
|
EXPORT_SYMBOL(set_page_dirty_lock);
|
|
|
|
/*
|
|
* Clear a page's dirty flag, while caring for dirty memory accounting.
|
|
* Returns true if the page was previously dirty.
|
|
*
|
|
* This is for preparing to put the page under writeout. We leave the page
|
|
* tagged as dirty in the radix tree so that a concurrent write-for-sync
|
|
* can discover it via a PAGECACHE_TAG_DIRTY walk. The ->writepage
|
|
* implementation will run either set_page_writeback() or set_page_dirty(),
|
|
* at which stage we bring the page's dirty flag and radix-tree dirty tag
|
|
* back into sync.
|
|
*
|
|
* This incoherency between the page's dirty flag and radix-tree tag is
|
|
* unfortunate, but it only exists while the page is locked.
|
|
*/
|
|
int clear_page_dirty_for_io(struct page *page)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
|
|
BUG_ON(!PageLocked(page));
|
|
|
|
if (mapping && mapping_cap_account_dirty(mapping)) {
|
|
/*
|
|
* Yes, Virginia, this is indeed insane.
|
|
*
|
|
* We use this sequence to make sure that
|
|
* (a) we account for dirty stats properly
|
|
* (b) we tell the low-level filesystem to
|
|
* mark the whole page dirty if it was
|
|
* dirty in a pagetable. Only to then
|
|
* (c) clean the page again and return 1 to
|
|
* cause the writeback.
|
|
*
|
|
* This way we avoid all nasty races with the
|
|
* dirty bit in multiple places and clearing
|
|
* them concurrently from different threads.
|
|
*
|
|
* Note! Normally the "set_page_dirty(page)"
|
|
* has no effect on the actual dirty bit - since
|
|
* that will already usually be set. But we
|
|
* need the side effects, and it can help us
|
|
* avoid races.
|
|
*
|
|
* We basically use the page "master dirty bit"
|
|
* as a serialization point for all the different
|
|
* threads doing their things.
|
|
*/
|
|
if (page_mkclean(page))
|
|
set_page_dirty(page);
|
|
/*
|
|
* We carefully synchronise fault handlers against
|
|
* installing a dirty pte and marking the page dirty
|
|
* at this point. We do this by having them hold the
|
|
* page lock at some point after installing their
|
|
* pte, but before marking the page dirty.
|
|
* Pages are always locked coming in here, so we get
|
|
* the desired exclusion. See mm/memory.c:do_wp_page()
|
|
* for more comments.
|
|
*/
|
|
if (TestClearPageDirty(page)) {
|
|
dec_zone_page_state(page, NR_FILE_DIRTY);
|
|
dec_bdi_stat(mapping->backing_dev_info,
|
|
BDI_RECLAIMABLE);
|
|
return 1;
|
|
}
|
|
return 0;
|
|
}
|
|
return TestClearPageDirty(page);
|
|
}
|
|
EXPORT_SYMBOL(clear_page_dirty_for_io);
|
|
|
|
int test_clear_page_writeback(struct page *page)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
int ret;
|
|
bool locked;
|
|
unsigned long memcg_flags;
|
|
|
|
mem_cgroup_begin_update_page_stat(page, &locked, &memcg_flags);
|
|
if (mapping) {
|
|
struct backing_dev_info *bdi = mapping->backing_dev_info;
|
|
unsigned long flags;
|
|
|
|
spin_lock_irqsave(&mapping->tree_lock, flags);
|
|
ret = TestClearPageWriteback(page);
|
|
if (ret) {
|
|
radix_tree_tag_clear(&mapping->page_tree,
|
|
page_index(page),
|
|
PAGECACHE_TAG_WRITEBACK);
|
|
if (bdi_cap_account_writeback(bdi)) {
|
|
__dec_bdi_stat(bdi, BDI_WRITEBACK);
|
|
__bdi_writeout_inc(bdi);
|
|
}
|
|
}
|
|
spin_unlock_irqrestore(&mapping->tree_lock, flags);
|
|
} else {
|
|
ret = TestClearPageWriteback(page);
|
|
}
|
|
if (ret) {
|
|
mem_cgroup_dec_page_stat(page, MEM_CGROUP_STAT_WRITEBACK);
|
|
dec_zone_page_state(page, NR_WRITEBACK);
|
|
inc_zone_page_state(page, NR_WRITTEN);
|
|
}
|
|
mem_cgroup_end_update_page_stat(page, &locked, &memcg_flags);
|
|
return ret;
|
|
}
|
|
|
|
int __test_set_page_writeback(struct page *page, bool keep_write)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
int ret;
|
|
bool locked;
|
|
unsigned long memcg_flags;
|
|
|
|
mem_cgroup_begin_update_page_stat(page, &locked, &memcg_flags);
|
|
if (mapping) {
|
|
struct backing_dev_info *bdi = mapping->backing_dev_info;
|
|
unsigned long flags;
|
|
|
|
spin_lock_irqsave(&mapping->tree_lock, flags);
|
|
ret = TestSetPageWriteback(page);
|
|
if (!ret) {
|
|
radix_tree_tag_set(&mapping->page_tree,
|
|
page_index(page),
|
|
PAGECACHE_TAG_WRITEBACK);
|
|
if (bdi_cap_account_writeback(bdi))
|
|
__inc_bdi_stat(bdi, BDI_WRITEBACK);
|
|
}
|
|
if (!PageDirty(page))
|
|
radix_tree_tag_clear(&mapping->page_tree,
|
|
page_index(page),
|
|
PAGECACHE_TAG_DIRTY);
|
|
if (!keep_write)
|
|
radix_tree_tag_clear(&mapping->page_tree,
|
|
page_index(page),
|
|
PAGECACHE_TAG_TOWRITE);
|
|
spin_unlock_irqrestore(&mapping->tree_lock, flags);
|
|
} else {
|
|
ret = TestSetPageWriteback(page);
|
|
}
|
|
if (!ret)
|
|
account_page_writeback(page);
|
|
mem_cgroup_end_update_page_stat(page, &locked, &memcg_flags);
|
|
return ret;
|
|
|
|
}
|
|
EXPORT_SYMBOL(__test_set_page_writeback);
|
|
|
|
/*
|
|
* Return true if any of the pages in the mapping are marked with the
|
|
* passed tag.
|
|
*/
|
|
int mapping_tagged(struct address_space *mapping, int tag)
|
|
{
|
|
return radix_tree_tagged(&mapping->page_tree, tag);
|
|
}
|
|
EXPORT_SYMBOL(mapping_tagged);
|
|
|
|
/**
|
|
* wait_for_stable_page() - wait for writeback to finish, if necessary.
|
|
* @page: The page to wait on.
|
|
*
|
|
* This function determines if the given page is related to a backing device
|
|
* that requires page contents to be held stable during writeback. If so, then
|
|
* it will wait for any pending writeback to complete.
|
|
*/
|
|
void wait_for_stable_page(struct page *page)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
struct backing_dev_info *bdi = mapping->backing_dev_info;
|
|
|
|
if (!bdi_cap_stable_pages_required(bdi))
|
|
return;
|
|
|
|
wait_on_page_writeback(page);
|
|
}
|
|
EXPORT_SYMBOL_GPL(wait_for_stable_page);
|