===============================
Documentation for /proc/sys/vm/
===============================

kernel version 2.6.29

Copyright (c) 1998, 1999,  Rik van Riel <riel@nl.linux.org>

Copyright (c) 2008         Peter W. Morreale <pmorreale@novell.com>

For general info and legal blurb, please look in index.rst.

------------------------------------------------------------------------------

This file contains the documentation for the sysctl files in
/proc/sys/vm and is valid for Linux kernel version 2.6.29.

The files in this directory can be used to tune the operation
of the virtual memory (VM) subsystem of the Linux kernel and
the writeout of dirty data to disk.

Currently, these files are in /proc/sys/vm:

- admin_reserve_kbytes
- compact_memory
- compaction_proactiveness
- compact_unevictable_allowed
- defrag_mode
- dirty_background_bytes
- dirty_background_ratio
- dirty_bytes
- dirty_expire_centisecs
- dirty_ratio
- dirtytime_expire_seconds
- dirty_writeback_centisecs
- drop_caches
- enable_soft_offline
- extfrag_threshold
- highmem_is_dirtyable
- hugetlb_shm_group
- legacy_va_layout
- lowmem_reserve_ratio
- max_map_count
- mem_profiling         (only if CONFIG_MEM_ALLOC_PROFILING=y)
- memory_failure_early_kill
- memory_failure_recovery
- min_free_kbytes
- min_slab_ratio
- min_unmapped_ratio
- mmap_min_addr
- mmap_rnd_bits
- mmap_rnd_compat_bits
- movable_gigantic_pages
- nr_hugepages
- nr_hugepages_mempolicy
- nr_overcommit_hugepages
- nr_trim_pages         (only if CONFIG_MMU=n)
- numa_zonelist_order
- oom_dump_tasks
- oom_kill_allocating_task
- overcommit_kbytes
- overcommit_memory
- overcommit_ratio
- page-cluster
- page_lock_unfairness
- panic_on_oom
- panic_on_unrecoverable_memory_failure
- percpu_pagelist_high_fraction
- stat_interval
- stat_refresh
- numa_stat
- swappiness
- unprivileged_userfaultfd
- user_reserve_kbytes
- vfs_cache_pressure
- vfs_cache_pressure_denom
- watermark_boost_factor
- watermark_scale_factor
- zone_reclaim_mode


admin_reserve_kbytes
====================

The amount of free memory in the system that should be reserved for users
with the capability cap_sys_admin.

admin_reserve_kbytes defaults to min(3% of free pages, 8MB)

That should provide enough for the admin to log in and kill a process,
if necessary, under the default overcommit 'guess' mode.

Systems running under overcommit 'never' should increase this to account
for the full Virtual Memory Size of programs used to recover. Otherwise,
root may not be able to log in to recover the system.

How do you calculate a minimum useful reserve?

sshd or login + bash (or some other shell) + top (or ps, kill, etc.)

For overcommit 'guess', we can sum resident set sizes (RSS).
On x86_64 this is about 8MB.

For overcommit 'never', we can take the max of their virtual sizes (VSZ)
and add the sum of their RSS.
On x86_64 this is about 128MB.

Changing this takes effect whenever an application requests memory.


compact_memory
==============

Available only when CONFIG_COMPACTION is set. When 1 is written to the file,
all zones are compacted such that free memory is available in contiguous
blocks where possible. This can be important for example in the allocation of
huge pages although processes will also directly compact memory as required.

compaction_proactiveness
========================

This tunable takes a value in the range [0, 100] with a default value of
20. This tunable determines how aggressively compaction is done in the
background. Write of a non zero value to this tunable will immediately
trigger the proactive compaction. Setting it to 0 disables proactive compaction.

Note that compaction has a non-trivial system-wide impact as pages
belonging to different processes are moved around, which could also lead
to latency spikes in unsuspecting applications. The kernel employs
various heuristics to avoid wasting CPU cycles if it detects that
proactive compaction is not being effective.

Setting the value above 80 will, in addition to lowering the acceptable level
of fragmentation, make the compaction code more sensitive to increases in
fragmentation, i.e. compaction will trigger more often, but reduce
fragmentation by a smaller amount.
This makes the fragmentation level more stable over time.

Be careful when setting it to extreme values like 100, as that may
cause excessive background compaction activity.

compact_unevictable_allowed
===========================

Available only when CONFIG_COMPACTION is set. When set to 1, compaction is
allowed to examine the unevictable lru (mlocked pages) for pages to compact.
This should be used on systems where stalls for minor page faults are an
acceptable trade for large contiguous free memory.  Set to 0 to prevent
compaction from moving pages that are unevictable.  Default value is 1.
On CONFIG_PREEMPT_RT the default value is 0 in order to avoid a page fault, due
to compaction, which would block the task from becoming active until the fault
is resolved.

defrag_mode
===========

When set to 1, the page allocator tries harder to avoid fragmentation
and maintain the ability to produce huge pages / higher-order pages.

It is recommended to enable this right after boot, as fragmentation,
once it occurred, can be long-lasting or even permanent.

dirty_background_bytes
======================

Contains the amount of dirty memory at which the background kernel
flusher threads will start writeback.

Note:
  dirty_background_bytes is the counterpart of dirty_background_ratio. Only
  one of them may be specified at a time. When one sysctl is written it is
  immediately taken into account to evaluate the dirty memory limits and the
  other appears as 0 when read.


dirty_background_ratio
======================

Contains, as a percentage of total available memory that contains free pages
and reclaimable pages, the number of pages at which the background kernel
flusher threads will start writing out dirty data.

The total available memory is not equal to total system memory.


dirty_bytes
===========

Contains the amount of dirty memory at which a process generating disk writes
will itself start writeback.

Note: dirty_bytes is the counterpart of dirty_ratio. Only one of them may be
specified at a time. When one sysctl is written it is immediately taken into
account to evaluate the dirty memory limits and the other appears as 0 when
read.

Note: the minimum value allowed for dirty_bytes is two pages (in bytes); any
value lower than this limit will be ignored and the old configuration will be
retained.


dirty_expire_centisecs
======================

This tunable is used to define when dirty data is old enough to be eligible
for writeout by the kernel flusher threads.  It is expressed in 100'ths
of a second.  Data which has been dirty in-memory for longer than this
interval will be written out next time a flusher thread wakes up.


dirty_ratio
===========

Contains, as a percentage of total available memory that contains free pages
and reclaimable pages, the number of pages at which a process which is
generating disk writes will itself start writing out dirty data.

The total available memory is not equal to total system memory.


dirtytime_expire_seconds
========================

When a lazytime inode is constantly having its pages dirtied, the inode with
an updated timestamp will never get chance to be written out.  And, if the
only thing that has happened on the file system is a dirtytime inode caused
by an atime update, a worker will be scheduled to make sure that inode
eventually gets pushed out to disk.  This tunable is used to define when dirty
inode is old enough to be eligible for writeback by the kernel flusher threads.
And, it is also used as the interval to wakeup dirtytime_writeback thread.

Setting this to zero disables periodic dirtytime writeback.


dirty_writeback_centisecs
=========================

The kernel flusher threads will periodically wake up and write `old` data
out to disk.  This tunable expresses the interval between those wakeups, in
100'ths of a second.

Setting this to zero disables periodic writeback altogether.


drop_caches
===========

Writing to this will cause the kernel to drop clean caches, as well as
reclaimable slab objects like dentries and inodes.  Once dropped, their
memory becomes free.

To free pagecache::

	echo 1 > /proc/sys/vm/drop_caches

To free reclaimable slab objects (includes dentries and inodes)::

	echo 2 > /proc/sys/vm/drop_caches

To free slab objects and pagecache::

	echo 3 > /proc/sys/vm/drop_caches

This is a non-destructive operation and will not free any dirty objects.
To increase the number of objects freed by this operation, the user may run
`sync` prior to writing to /proc/sys/vm/drop_caches.  This will minimize the
number of dirty objects on the system and create more candidates to be
dropped.

This file is not a means to control the growth of the various kernel caches
(inodes, dentries, pagecache, etc...)  These objects are automatically
reclaimed by the kernel when memory is needed elsewhere on the system.

Use of this file can cause performance problems.  Since it discards cached
objects, it may cost a significant amount of I/O and CPU to recreate the
dropped objects, especially if they were under heavy use.  Because of this,
use outside of a testing or debugging environment is not recommended.

You may see informational messages in your kernel log when this file is
used::

	cat (1234): drop_caches: 3

These are informational only.  They do not mean that anything is wrong
with your system.  To disable them, echo 4 (bit 2) into drop_caches.

enable_soft_offline
===================
Correctable memory errors are very common on servers. Soft-offline is kernel's
solution for memory pages having (excessive) corrected memory errors.

For different types of page, soft-offline has different behaviors / costs.

- For a raw error page, soft-offline migrates the in-use page's content to
  a new raw page.

- For a page that is part of a transparent hugepage, soft-offline splits the
  transparent hugepage into raw pages, then migrates only the raw error page.
  As a result, user is transparently backed by 1 less hugepage, impacting
  memory access performance.

- For a page that is part of a HugeTLB hugepage, soft-offline first migrates
  the entire HugeTLB hugepage, during which a free hugepage will be consumed
  as migration target.  Then the original hugepage is dissolved into raw
  pages without compensation, reducing the capacity of the HugeTLB pool by 1.

It is user's call to choose between reliability (staying away from fragile
physical memory) vs performance / capacity implications in transparent and
HugeTLB cases.

For all architectures, enable_soft_offline controls whether to soft offline
memory pages.  When set to 1, kernel attempts to soft offline the pages
whenever it thinks needed.  When set to 0, kernel returns EOPNOTSUPP to
the request to soft offline the pages.  Its default value is 1.

It is worth mentioning that after setting enable_soft_offline to 0, the
following requests to soft offline pages will not be performed:

- Request to soft offline pages from RAS Correctable Errors Collector.

- On ARM, the request to soft offline pages from GHES driver.

- On PARISC, the request to soft offline pages from Page Deallocation Table.

extfrag_threshold
=================

This parameter affects whether the kernel will compact memory or direct
reclaim to satisfy a high-order allocation. The extfrag/extfrag_index file in
debugfs shows what the fragmentation index for each order is in each zone in
the system. Values tending towards 0 imply allocations would fail due to lack
of memory, values towards 1000 imply failures are due to fragmentation and -1
implies that the allocation will succeed as long as watermarks are met.

The kernel will not compact memory in a zone if the
fragmentation index is <= extfrag_threshold. The default value is 500.


highmem_is_dirtyable
====================

Available only for systems with CONFIG_HIGHMEM enabled (32b systems).

This parameter controls whether the high memory is considered for dirty
writers throttling.  This is not the case by default which means that
only the amount of memory directly visible/usable by the kernel can
be dirtied. As a result, on systems with a large amount of memory and
lowmem basically depleted writers might be throttled too early and
streaming writes can get very slow.

Changing the value to non zero would allow more memory to be dirtied
and thus allow writers to write more data which can be flushed to the
storage more effectively. Note this also comes with a risk of pre-mature
OOM killer because some writers (e.g. direct block device writes) can
only use the low memory and they can fill it up with dirty data without
any throttling.


hugetlb_shm_group
=================

hugetlb_shm_group contains group id that is allowed to create SysV
shared memory segment using hugetlb page.


legacy_va_layout
================

If non-zero, this sysctl disables the new 32-bit mmap layout - the kernel
will use the legacy (2.4) layout for all processes.


lowmem_reserve_ratio
====================

For some specialised workloads on highmem machines it is dangerous for
the kernel to allow process memory to be allocated from the "lowmem"
zone.  This is because that memory could then be pinned via the mlock()
system call, or by unavailability of swapspace.

And on large highmem machines this lack of reclaimable lowmem memory
can be fatal.

So the Linux page allocator has a mechanism which prevents allocations
which *could* use highmem from using too much lowmem.  This means that
a certain amount of lowmem is defended from the possibility of being
captured into pinned user memory.

(The same argument applies to the old 16 megabyte ISA DMA region.  This
mechanism will also defend that region from allocations which could use
highmem or lowmem).

The `lowmem_reserve_ratio` tunable determines how aggressive the kernel is
in defending these lower zones.

If you have a machine which uses highmem or ISA DMA and your
applications are using mlock(), or if you are running with no swap then
you probably should change the lowmem_reserve_ratio setting.

The lowmem_reserve_ratio is an array. You can see them by reading this file::

	% cat /proc/sys/vm/lowmem_reserve_ratio
	256     256     32

But, these values are not used directly. The kernel calculates # of protection
pages for each zones from them. These are shown as array of protection pages
in /proc/zoneinfo like the following. (This is an example of x86-64 box).
Each zone has an array of protection pages like this::

  Node 0, zone      DMA
    pages free     1355
          min      3
          low      3
          high     4
	:
	:
      numa_other   0
          protection: (0, 2004, 2004, 2004)
	^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^
    pagesets
      cpu: 0 pcp: 0
          :

These protections are added to score to judge whether this zone should be used
for page allocation or should be reclaimed.

In this example, if normal pages (index=2) are required to this DMA zone and
watermark[WMARK_HIGH] is used for watermark, the kernel judges this zone should
not be used because pages_free(1355) is smaller than watermark + protection[2]
(4 + 2004 = 2008). If this protection value is 0, this zone would be used for
normal page requirement. If requirement is DMA zone(index=0), protection[0]
(=0) is used.

zone[i]'s protection[j] is calculated by following expression::

  (i < j):
    zone[i]->protection[j]
    = (total sums of managed_pages from zone[i+1] to zone[j] on the node)
      / lowmem_reserve_ratio[i];
  (i = j):
     (should not be protected. = 0;
  (i > j):
     (not necessary, but looks 0)

The default values of lowmem_reserve_ratio[i] are

    === ====================================
    256 (if zone[i] means DMA or DMA32 zone)
    32  (others)
    === ====================================

As above expression, they are reciprocal number of ratio.
256 means 1/256. # of protection pages becomes about "0.39%" of total managed
pages of higher zones on the node.

If you would like to protect more pages, smaller values are effective.
The minimum value is 1 (1/1 -> 100%). The value less than 1 completely
disables protection of the pages.


max_map_count
=============

This file contains the maximum number of memory map areas a process
may have. Memory map areas are used as a side-effect of calling
malloc, directly by mmap, mprotect, and madvise, and also when loading
shared libraries.

While most applications need less than a thousand maps, certain
programs, particularly malloc debuggers, may consume lots of them,
e.g., up to one or two maps per allocation.

The default value is 65530.


mem_profiling
==============

Enable memory profiling (when CONFIG_MEM_ALLOC_PROFILING=y)

1: Enable memory profiling.

0: Disable memory profiling.

Enabling memory profiling introduces a small performance overhead for all
memory allocations.

The default value depends on CONFIG_MEM_ALLOC_PROFILING_ENABLED_BY_DEFAULT.

When CONFIG_MEM_ALLOC_PROFILING_DEBUG=y, this control is read-only to avoid
warnings produced by allocations made while profiling is disabled and freed
when it's enabled.


memory_failure_early_kill
=========================

Control how to kill processes when uncorrected memory error (typically
a 2bit error in a memory module) is detected in the background by hardware
that cannot be handled by the kernel. In some cases (like the page
still having a valid copy on disk) the kernel will handle the failure
transparently without affecting any applications. But if there is
no other up-to-date copy of the data it will kill to prevent any data
corruptions from propagating.

1: Kill all processes that have the corrupted and not reloadable page mapped
as soon as the corruption is detected.  Note this is not supported
for a few types of pages, like kernel internally allocated data or
the swap cache, but works for the majority of user pages.

0: Only unmap the corrupted page from all processes and only kill a process
who tries to access it.

The kill is done using a catchable SIGBUS with BUS_MCEERR_AO, so processes can
handle this if they want to.

This is only active on architectures/platforms with advanced machine
check handling and depends on the hardware capabilities.

Applications can override this setting individually with the PR_MCE_KILL prctl


memory_failure_recovery
=======================

Enable memory failure recovery (when supported by the platform)

1: Attempt recovery.

0: Always panic on a memory failure.


min_free_kbytes
===============

This is used to force the Linux VM to keep a minimum number
of kilobytes free.  The VM uses this number to compute a
watermark[WMARK_MIN] value for each lowmem zone in the system.
Each lowmem zone gets a number of reserved free pages based
proportionally on its size.

Some minimal amount of memory is needed to satisfy PF_MEMALLOC
allocations; if you set this to lower than 1024KB, your system will
become subtly broken, and prone to deadlock under high loads.

Setting this too high will OOM your machine instantly.


min_slab_ratio
==============

This is available only on NUMA kernels.

A percentage of the total pages in each zone.  On Zone reclaim
(fallback from the local zone occurs) slabs will be reclaimed if more
than this percentage of pages in a zone are reclaimable slab pages.
This insures that the slab growth stays under control even in NUMA
systems that rarely perform global reclaim.

The default is 5 percent.

Note that slab reclaim is triggered in a per zone / node fashion.
The process of reclaiming slab memory is currently not node specific
and may not be fast.


min_unmapped_ratio
==================

This is available only on NUMA kernels.

This is a percentage of the total pages in each zone. Zone reclaim will
only occur if more than this percentage of pages are in a state that
zone_reclaim_mode allows to be reclaimed.

If zone_reclaim_mode has the value 4 OR'd, then the percentage is compared
against all file-backed unmapped pages including swapcache pages and tmpfs
files. Otherwise, only unmapped pages backed by normal files but not tmpfs
files and similar are considered.

The default is 1 percent.


mmap_min_addr
=============

This file indicates the amount of address space  which a user process will
be restricted from mmapping.  Since kernel null dereference bugs could
accidentally operate based on the information in the first couple of pages
of memory userspace processes should not be allowed to write to them.  By
default this value is set to 0 and no protections will be enforced by the
security module.  Setting this value to something like 64k will allow the
vast majority of applications to work correctly and provide defense in depth
against future potential kernel bugs.


mmap_rnd_bits
=============

This value can be used to select the number of bits to use to
determine the random offset to the base address of vma regions
resulting from mmap allocations on architectures which support
tuning address space randomization.  This value will be bounded
by the architecture's minimum and maximum supported values.

This value can be changed after boot using the
/proc/sys/vm/mmap_rnd_bits tunable


mmap_rnd_compat_bits
====================

This value can be used to select the number of bits to use to
determine the random offset to the base address of vma regions
resulting from mmap allocations for applications run in
compatibility mode on architectures which support tuning address
space randomization.  This value will be bounded by the
architecture's minimum and maximum supported values.

This value can be changed after boot using the
/proc/sys/vm/mmap_rnd_compat_bits tunable


movable_gigantic_pages
======================

This parameter controls whether gigantic pages may be allocated from
ZONE_MOVABLE. If set to non-zero, gigantic pages can be allocated
from ZONE_MOVABLE. ZONE_MOVABLE memory may be created via the kernel
boot parameter `kernelcore` or via memory hotplug as discussed in
Documentation/admin-guide/mm/memory-hotplug.rst.

Support may depend on specific architecture.

Note that using ZONE_MOVABLE gigantic pages make memory hotremove unreliable.

Memory hot-remove operations will block indefinitely until the admin reserves
sufficient gigantic pages to service migration requests associated with the
memory offlining process.  As HugeTLB gigantic page reservation is a manual
process (via `nodeN/hugepages/.../nr_hugepages` interfaces) this may not be
obvious when just attempting to offline a block of memory.

Additionally, as multiple gigantic pages may be reserved on a single block,
it may appear that gigantic pages are available for migration when in reality
they are in the process of being removed. For example if `memoryN` contains
two gigantic pages, one reserved and one allocated, and an admin attempts to
offline that block, this operations may hang indefinitely unless another
reserved gigantic page is available on another block `memoryM`.


nr_hugepages
============

Change the minimum size of the hugepage pool.

See Documentation/admin-guide/mm/hugetlbpage.rst


hugetlb_optimize_vmemmap
========================

This knob is not available when the size of 'struct page' (a structure defined
in include/linux/mm_types.h) is not power of two (an unusual system config could
result in this).

Enable (set to 1) or disable (set to 0) HugeTLB Vmemmap Optimization (HVO).

Once enabled, the vmemmap pages of subsequent allocation of HugeTLB pages from
buddy allocator will be optimized (7 pages per 2MB HugeTLB page and 4095 pages
per 1GB HugeTLB page), whereas already allocated HugeTLB pages will not be
optimized.  When those optimized HugeTLB pages are freed from the HugeTLB pool
to the buddy allocator, the vmemmap pages representing that range needs to be
remapped again and the vmemmap pages discarded earlier need to be rellocated
again.  If your use case is that HugeTLB pages are allocated 'on the fly' (e.g.
never explicitly allocating HugeTLB pages with 'nr_hugepages' but only set
'nr_overcommit_hugepages', those overcommitted HugeTLB pages are allocated 'on
the fly') instead of being pulled from the HugeTLB pool, you should weigh the
benefits of memory savings against the more overhead (~2x slower than before)
of allocation or freeing HugeTLB pages between the HugeTLB pool and the buddy
allocator.  Another behavior to note is that if the system is under heavy memory
pressure, it could prevent the user from freeing HugeTLB pages from the HugeTLB
pool to the buddy allocator since the allocation of vmemmap pages could be
failed, you have to retry later if your system encounter this situation.

Once disabled, the vmemmap pages of subsequent allocation of HugeTLB pages from
buddy allocator will not be optimized meaning the extra overhead at allocation
time from buddy allocator disappears, whereas already optimized HugeTLB pages
will not be affected.  If you want to make sure there are no optimized HugeTLB
pages, you can set "nr_hugepages" to 0 first and then disable this.  Note that
writing 0 to nr_hugepages will make any "in use" HugeTLB pages become surplus
pages.  So, those surplus pages are still optimized until they are no longer
in use.  You would need to wait for those surplus pages to be released before
there are no optimized pages in the system.


nr_hugepages_mempolicy
======================

Change the size of the hugepage pool at run-time on a specific
set of NUMA nodes.

See Documentation/admin-guide/mm/hugetlbpage.rst


nr_overcommit_hugepages
=======================

Change the maximum size of the hugepage pool. The maximum is
nr_hugepages + nr_overcommit_hugepages.

See Documentation/admin-guide/mm/hugetlbpage.rst


nr_trim_pages
=============

This is available only on NOMMU kernels.

This value adjusts the excess page trimming behaviour of power-of-2 aligned
NOMMU mmap allocations.

A value of 0 disables trimming of allocations entirely, while a value of 1
trims excess pages aggressively. Any value >= 1 acts as the watermark where
trimming of allocations is initiated.

The default value is 1.

See Documentation/admin-guide/mm/nommu-mmap.rst for more information.


numa_zonelist_order
===================

This sysctl is only for NUMA and it is deprecated. Anything but
Node order will fail!

'where the memory is allocated from' is controlled by zonelists.

(This documentation ignores ZONE_HIGHMEM/ZONE_DMA32 for simple explanation.
you may be able to read ZONE_DMA as ZONE_DMA32...)

In non-NUMA case, a zonelist for GFP_KERNEL is ordered as following.
ZONE_NORMAL -> ZONE_DMA
This means that a memory allocation request for GFP_KERNEL will
get memory from ZONE_DMA only when ZONE_NORMAL is not available.

In NUMA case, you can think of following 2 types of order.
Assume 2 node NUMA and below is zonelist of Node(0)'s GFP_KERNEL::

  (A) Node(0) ZONE_NORMAL -> Node(0) ZONE_DMA -> Node(1) ZONE_NORMAL
  (B) Node(0) ZONE_NORMAL -> Node(1) ZONE_NORMAL -> Node(0) ZONE_DMA.

Type(A) offers the best locality for processes on Node(0), but ZONE_DMA
will be used before ZONE_NORMAL exhaustion. This increases possibility of
out-of-memory(OOM) of ZONE_DMA because ZONE_DMA is tend to be small.

Type(B) cannot offer the best locality but is more robust against OOM of
the DMA zone.

Type(A) is called as "Node" order. Type (B) is "Zone" order.

"Node order" orders the zonelists by node, then by zone within each node.
Specify "[Nn]ode" for node order

"Zone Order" orders the zonelists by zone type, then by node within each
zone.  Specify "[Zz]one" for zone order.

Specify "[Dd]efault" to request automatic configuration.

On 32-bit, the Normal zone needs to be preserved for allocations accessible
by the kernel, so "zone" order will be selected.

On 64-bit, devices that require DMA32/DMA are relatively rare, so "node"
order will be selected.

Default order is recommended unless this is causing problems for your
system/application.


oom_dump_tasks
==============

Enables a system-wide task dump (excluding kernel threads) to be produced
when the kernel performs an OOM-killing and includes such information as
pid, uid, tgid, vm size, rss, pgtables_bytes, swapents, oom_score_adj
score, and name.  This is helpful to determine why the OOM killer was
invoked, to identify the rogue task that caused it, and to determine why
the OOM killer chose the task it did to kill.

If this is set to zero, this information is suppressed.  On very
large systems with thousands of tasks it may not be feasible to dump
the memory state information for each one.  Such systems should not
be forced to incur a performance penalty in OOM conditions when the
information may not be desired.

If this is set to non-zero, this information is shown whenever the
OOM killer actually kills a memory-hogging task.

The default value is 1 (enabled).


oom_kill_allocating_task
========================

This enables or disables killing the OOM-triggering task in
out-of-memory situations.

If this is set to zero, the OOM killer will scan through the entire
tasklist and select a task based on heuristics to kill.  This normally
selects a rogue memory-hogging task that frees up a large amount of
memory when killed.

If this is set to non-zero, the OOM killer simply kills the task that
triggered the out-of-memory condition.  This avoids the expensive
tasklist scan.

If panic_on_oom is selected, it takes precedence over whatever value
is used in oom_kill_allocating_task.

The default value is 0.


overcommit_kbytes
=================

When overcommit_memory is set to 2, the committed address space is not
permitted to exceed swap plus this amount of physical RAM. See below.

Note: overcommit_kbytes is the counterpart of overcommit_ratio. Only one
of them may be specified at a time. Setting one disables the other (which
then appears as 0 when read).


overcommit_memory
=================

This value contains a flag that enables memory overcommitment.

When this flag is 0, the kernel compares the userspace memory request
size against total memory plus swap and rejects obvious overcommits.

When this flag is 1, the kernel pretends there is always enough
memory until it actually runs out.

When this flag is 2, the kernel uses a "never overcommit"
policy that attempts to prevent any overcommit of memory.
Note that user_reserve_kbytes affects this policy.

This feature can be very useful because there are a lot of
programs that malloc() huge amounts of memory "just-in-case"
and don't use much of it.

The default value is 0.

See Documentation/mm/overcommit-accounting.rst and
mm/util.c::__vm_enough_memory() for more information.


overcommit_ratio
================

When overcommit_memory is set to 2, the committed address
space is not permitted to exceed swap plus this percentage
of physical RAM.  See above.


page-cluster
============

page-cluster controls the number of pages up to which consecutive pages
are read in from swap in a single attempt. This is the swap counterpart
to page cache readahead.
The mentioned consecutivity is not in terms of virtual/physical addresses,
but consecutive on swap space - that means they were swapped out together.

It is a logarithmic value - setting it to zero means "1 page", setting
it to 1 means "2 pages", setting it to 2 means "4 pages", etc.
Zero disables swap readahead completely.

The default value is three (eight pages at a time).  There may be some
small benefits in tuning this to a different value if your workload is
swap-intensive.

Lower values mean lower latencies for initial faults, but at the same time
extra faults and I/O delays for following faults if they would have been part of
that consecutive pages readahead would have brought in.


page_lock_unfairness
====================

This value determines the number of times that the page lock can be
stolen from under a waiter. After the lock is stolen the number of times
specified in this file (default is 5), the "fair lock handoff" semantics
will apply, and the waiter will only be awakened if the lock can be taken.

panic_on_oom
============

This enables or disables panic on out-of-memory feature.

If this is set to 0, the kernel will kill some rogue process,
called oom_killer.  Usually, oom_killer can kill rogue processes and
system will survive.

If this is set to 1, the kernel panics when out-of-memory happens.
However, if a process limits using nodes by mempolicy/cpusets,
and those nodes become memory exhaustion status, one process
may be killed by oom-killer. No panic occurs in this case.
Because other nodes' memory may be free. This means system total status
may be not fatal yet.

If this is set to 2, the kernel panics compulsorily even on the
above-mentioned. Even oom happens under memory cgroup, the whole
system panics.

The default value is 0.

1 and 2 are for failover of clustering. Please select either
according to your policy of failover.

panic_on_oom=2+kdump gives you very strong tool to investigate
why oom happens. You can get snapshot.


panic_on_unrecoverable_memory_failure
======================================

When a hardware memory error (e.g. multi-bit ECC) hits a kernel page
that cannot be recovered by the memory failure handler, the default
behaviour is to ignore the error and continue operation.  This is
dangerous because the corrupted data remains accessible to the kernel,
risking silent data corruption or a delayed crash when the poisoned
memory is next accessed.

When enabled, this sysctl triggers a panic on memory failure events
hitting kernel-owned pages that the handler cannot recover:
``PageReserved`` (firmware reservations, kernel image, vDSO, zero
page, and similar memblock-reserved regions), ``PageSlab``,
``PageTable``, and ``PageLargeKmalloc``.  These are owned by the
kernel and the memory failure handler cannot reliably evict their
contents.

Other unrecoverable kernel-owned populations (vmalloc allocations,
kernel stack pages, ...) are not currently covered because the
handler has no page-type signal that distinguishes them from a
userspace folio temporarily off the LRU during migration or
compaction.  Such pages still go through the standard
MF_MSG_GET_HWPOISON path: ``PG_hwpoison`` is set on them and a
delayed crash on the next access remains possible.  Coverage may
grow as the handler gains stronger kernel-ownership signals.

Recoverable failure paths are also intentionally left out: in-flight
buddy allocations and other transient races with the page allocator
can reach the same diagnostic, and panicking on them would risk
killing the box for a page destined for userspace where the standard
SIGBUS recovery path applies.  Pages whose state could not be
classified at all are not covered either, since an unknown state is
not a sound basis for a panic decision.

For many environments it is preferable to panic immediately with a clean
crash dump that captures the original error context, rather than to
continue and face a random crash later whose cause is difficult to
diagnose.

Use cases
---------

This option is most useful in environments where unattributed crashes
are expensive to debug or where data integrity must take precedence
over availability:

* Large fleets, where multi-bit ECC errors on kernel pages are observed
  regularly and post-mortem analysis of an unrelated downstream crash
  (often seconds to minutes after the original error) consumes
  significant engineering effort.

* Systems configured with kdump, where panicking at the moment of the
  hardware error produces a vmcore that still contains the faulting
  address, the affected page state, and the originating MCE/GHES
  record — context that is typically lost by the time a delayed crash
  occurs.

* High-availability clusters that rely on fast, deterministic node
  failure for failover, and prefer an immediate panic over silent data
  corruption propagating to replicas or persistent storage.

* Kernel and platform developers reproducing hwpoison issues with
  tools such as ``mce-inject`` or error-injection debugfs interfaces,
  where panicking on the unrecoverable path makes regressions
  immediately visible instead of surfacing as later, unrelated
  failures.

= =====================================================================
0 Try to continue operation (default).
1 Panic immediately.  If the ``panic`` sysctl is also non-zero then the
  machine will be rebooted.
= =====================================================================

Example::

     echo 1 > /proc/sys/vm/panic_on_unrecoverable_memory_failure


percpu_pagelist_high_fraction
=============================

This is the fraction of pages in each zone that are can be stored to
per-cpu page lists. It is an upper boundary that is divided depending
on the number of online CPUs. The min value for this is 8 which means
that we do not allow more than 1/8th of pages in each zone to be stored
on per-cpu page lists. This entry only changes the value of hot per-cpu
page lists. A user can specify a number like 100 to allocate 1/100th of
each zone between per-cpu lists.

The batch value of each per-cpu page list remains the same regardless of
the value of the high fraction so allocation latencies are unaffected.

The initial value is zero. Kernel uses this value to set the high pcp->high
mark based on the low watermark for the zone and the number of local
online CPUs.  If the user writes '0' to this sysctl, it will revert to
this default behavior.


stat_interval
=============

The time interval between which vm statistics are updated.  The default
is 1 second.


stat_refresh
============

Any read or write (by root only) flushes all the per-cpu vm statistics
into their global totals, for more accurate reports when testing
e.g. cat /proc/sys/vm/stat_refresh /proc/meminfo

As a side-effect, it also checks for negative totals (elsewhere reported
as 0) and "fails" with EINVAL if any are found, with a warning in dmesg.
(At time of writing, a few stats are known sometimes to be found negative,
with no ill effects: errors and warnings on these stats are suppressed.)


numa_stat
=========

This interface allows runtime configuration of numa statistics.

When page allocation performance becomes a bottleneck and you can tolerate
some possible tool breakage and decreased numa counter precision, you can
do::

	echo 0 > /proc/sys/vm/numa_stat

When page allocation performance is not a bottleneck and you want all
tooling to work, you can do::

	echo 1 > /proc/sys/vm/numa_stat


swappiness
==========

This control is used to define the rough relative IO cost of swapping
and filesystem paging, as a value between 0 and 200. At 100, the VM
assumes equal IO cost and will thus apply memory pressure to the page
cache and swap-backed pages equally; lower values signify more
expensive swap IO, higher values indicates cheaper.

Keep in mind that filesystem IO patterns under memory pressure tend to
be more efficient than swap's random IO. An optimal value will require
experimentation and will also be workload-dependent.

The default value is 60.

For in-memory swap, like zram or zswap, as well as hybrid setups that
have swap on faster devices than the filesystem, values beyond 100 can
be considered. For example, if the random IO against the swap device
is on average 2x faster than IO from the filesystem, swappiness should
be 133 (x + 2x = 200, 2x = 133.33).

At 0, the kernel will not initiate swap until the amount of free and
file-backed pages is less than the high watermark in a zone.


unprivileged_userfaultfd
========================

This flag controls the mode in which unprivileged users can use the
userfaultfd system calls. Set this to 0 to restrict unprivileged users
to handle page faults in user mode only. In this case, users without
SYS_CAP_PTRACE must pass UFFD_USER_MODE_ONLY in order for userfaultfd to
succeed. Prohibiting use of userfaultfd for handling faults from kernel
mode may make certain vulnerabilities more difficult to exploit.

Set this to 1 to allow unprivileged users to use the userfaultfd system
calls without any restrictions.

The default value is 0.

Another way to control permissions for userfaultfd is to use
/dev/userfaultfd instead of userfaultfd(2). See
Documentation/admin-guide/mm/userfaultfd.rst.

user_reserve_kbytes
===================

When overcommit_memory is set to 2, "never overcommit" mode, reserve
min(3% of current process size, user_reserve_kbytes) of free memory.
This is intended to prevent a user from starting a single memory hogging
process, such that they cannot recover (kill the hog).

This setting has no effect when overcommit_memory is set to 0 or 1.

user_reserve_kbytes defaults to min(3% of the current process size, 128MB).

If this is reduced to zero, then the user will be allowed to allocate
all free memory with a single process, minus admin_reserve_kbytes.
Any subsequent attempts to execute a command will result in
"fork: Cannot allocate memory".

Changing this takes effect whenever an application requests memory.


vfs_cache_pressure
==================

This percentage value controls the tendency of the kernel to reclaim
the memory which is used for caching of directory and inode objects.

At the default value of vfs_cache_pressure=vfs_cache_pressure_denom the kernel
will attempt to reclaim dentries and inodes at a "fair" rate with respect to
pagecache and swapcache reclaim.  Decreasing vfs_cache_pressure causes the
kernel to prefer to retain dentry and inode caches. When vfs_cache_pressure=0,
the kernel will never reclaim dentries and inodes due to memory pressure and
this can easily lead to out-of-memory conditions. Increasing vfs_cache_pressure
beyond vfs_cache_pressure_denom causes the kernel to prefer to reclaim dentries
and inodes.

Increasing vfs_cache_pressure significantly beyond vfs_cache_pressure_denom may
have negative performance impact. Reclaim code needs to take various locks to
find freeable directory and inode objects. When vfs_cache_pressure equals
(10 * vfs_cache_pressure_denom), it will look for ten times more freeable
objects than there are.

Note: This setting should always be used together with vfs_cache_pressure_denom.

vfs_cache_pressure_denom
========================

Defaults to 100 (minimum allowed value). Requires corresponding
vfs_cache_pressure setting to take effect.

watermark_boost_factor
======================

This factor controls the level of reclaim when memory is being fragmented.
It defines the percentage of the high watermark of a zone that will be
reclaimed if pages of different mobility are being mixed within pageblocks.
The intent is that compaction has less work to do in the future and to
increase the success rate of future high-order allocations such as SLUB
allocations, THP and hugetlbfs pages.

To make it sensible with respect to the watermark_scale_factor
parameter, the unit is in fractions of 10,000. The default value of
15,000 means that up to 150% of the high watermark will be reclaimed in the
event of a pageblock being mixed due to fragmentation. The level of reclaim
is determined by the number of fragmentation events that occurred in the
recent past. If this value is smaller than a pageblock then a pageblocks
worth of pages will be reclaimed (e.g.  2MB on 64-bit x86). A boost factor
of 0 will disable the feature.


watermark_scale_factor
======================

This factor controls the aggressiveness of kswapd. It defines the
amount of memory left in a node/system before kswapd is woken up and
how much memory needs to be free before kswapd goes back to sleep.

The unit is in fractions of 10,000. The default value of 10 means the
distances between watermarks are 0.1% of the available memory in the
node/system. The maximum value is 3000, or 30% of memory.

A high rate of threads entering direct reclaim (allocstall) or kswapd
going to sleep prematurely (kswapd_low_wmark_hit_quickly) can indicate
that the number of free pages kswapd maintains for latency reasons is
too small for the allocation bursts occurring in the system. This knob
can then be used to tune kswapd aggressiveness accordingly.


zone_reclaim_mode
=================

Zone_reclaim_mode allows someone to set more or less aggressive approaches to
reclaim memory when a zone runs out of memory. If it is set to zero then no
zone reclaim occurs. Allocations will be satisfied from other zones / nodes
in the system.

This is value OR'ed together of

=	===================================
1	Zone reclaim on
2	Zone reclaim writes dirty pages out
4	Zone reclaim swaps pages
=	===================================

zone_reclaim_mode is disabled by default.  For file servers or workloads
that benefit from having their data cached, zone_reclaim_mode should be
left disabled as the caching effect is likely to be more important than
data locality.

Consider enabling one or more zone_reclaim mode bits if it's known that the
workload is partitioned such that each partition fits within a NUMA node
and that accessing remote memory would cause a measurable performance
reduction.  The page allocator will take additional actions before
allocating off node pages.

Allowing zone reclaim to write out pages stops processes that are
writing large amounts of data from dirtying pages on other nodes. Zone
reclaim will write out dirty pages if a zone fills up and so effectively
throttle the process. This may decrease the performance of a single process
since it cannot use all of system memory to buffer the outgoing writes
anymore but it preserve the memory on other nodes so that the performance
of other processes running on other nodes will not be affected.

Allowing regular swap effectively restricts allocations to the local
node unless explicitly overridden by memory policies or cpuset
configurations.