- 30 Apr, 2021 40 commits
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Wan Jiabing authored
struct mem_cgroup is declared twice. One has been declared at forward struct declaration. Remove the duplicate. Link: https://lkml.kernel.org/r/20210330020246.2265371-1-wanjiabing@vivo.comSigned-off-by:
Wan Jiabing <wanjiabing@vivo.com> Reviewed-by:
Muchun Song <songmuchun@bytedance.com> Acked-by:
Michal Hocko <mhocko@suse.com> Signed-off-by:
Andrew Morton <akpm@linux-foundation.org> Signed-off-by:
Linus Torvalds <torvalds@linux-foundation.org>
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Muchun Song authored
The page only can be marked as kmem when CONFIG_MEMCG_KMEM is enabled. So move PageMemcgKmem() to the scope of the CONFIG_MEMCG_KMEM. As a bonus, on !CONFIG_MEMCG_KMEM build some code can be compiled out. Link: https://lkml.kernel.org/r/20210319163821.20704-8-songmuchun@bytedance.comSigned-off-by:
Roman Gushchin <guro@fb.com> Reviewed-by:
Shakeel Butt <shakeelb@google.com> Acked-by:
Johannes Weiner <hannes@cmpxchg.org> Cc: Michal Hocko <mhocko@kernel.org> Cc: Vladimir Davydov <vdavydov.dev@gmail.com> Cc: Xiongchun Duan <duanxiongchun@bytedance.com> Signed-off-by:
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Muchun Song authored
There is only one user of __memcg_kmem_charge(), so manually inline __memcg_kmem_charge() to obj_cgroup_charge_pages(). Similarly manually inline __memcg_kmem_uncharge() into obj_cgroup_uncharge_pages() and call obj_cgroup_uncharge_pages() in obj_cgroup_release(). This is just code cleanup without any functionality changes. Link: https://lkml.kernel.org/r/20210319163821.20704-7-songmuchun@bytedance.comSigned-off-by:
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Muchun Song authored
Since Roman's series "The new cgroup slab memory controller" applied. All slab objects are charged via the new APIs of obj_cgroup. The new APIs introduce a struct obj_cgroup to charge slab objects. It prevents long-living objects from pinning the original memory cgroup in the memory. But there are still some corner objects (e.g. allocations larger than order-1 page on SLUB) which are not charged via the new APIs. Those objects (include the pages which are allocated from buddy allocator directly) are charged as kmem pages which still hold a reference to the memory cgroup. We want to reuse the obj_cgroup APIs to charge the kmem pages. If we do that, we should store an object cgroup pointer to page->memcg_data for the kmem pages. Finally, page->memcg_data will have 3 different meanings. 1) For the slab pages, page->memcg_data points to an object cgroups vector. 2) For the kmem pages (exclude the slab pages), page->memcg_data points to an object cgroup. 3) For the user pages (e.g. the LRU pages), page->memcg_data points to a memory cgroup. We do not change the behavior of page_memcg() and page_memcg_rcu(). They are also suitable for LRU pages and kmem pages. Why? Because memory allocations pinning memcgs for a long time - it exists at a larger scale and is causing recurring problems in the real world: page cache doesn't get reclaimed for a long time, or is used by the second, third, fourth, ... instance of the same job that was restarted into a new cgroup every time. Unreclaimable dying cgroups pile up, waste memory, and make page reclaim very inefficient. We can convert LRU pages and most other raw memcg pins to the objcg direction to fix this problem, and then the page->memcg will always point to an object cgroup pointer. At that time, LRU pages and kmem pages will be treated the same. The implementation of page_memcg() will remove the kmem page check. This patch aims to charge the kmem pages by using the new APIs of obj_cgroup. Finally, the page->memcg_data of the kmem page points to an object cgroup. We can use the __page_objcg() to get the object cgroup associated with a kmem page. Or we can use page_memcg() to get the memory cgroup associated with a kmem page, but caller must ensure that the returned memcg won't be released (e.g. acquire the rcu_read_lock or css_set_lock). Link: https://lkml.kernel.org/r/20210401030141.37061-1-songmuchun@bytedance.com Link: https://lkml.kernel.org/r/20210319163821.20704-6-songmuchun@bytedance.comSigned-off-by:Miaohe Lin <linmiaohe@huawei.com> Cc: Michal Hocko <mhocko@kernel.org> Cc: Vladimir Davydov <vdavydov.dev@gmail.com> Cc: Xiongchun Duan <duanxiongchun@bytedance.com> Cc: Christian Borntraeger <borntraeger@de.ibm.com> [songmuchun@bytedance.com: fix forget to obtain the ref to objcg in split_page_memcg] Signed-off-by:
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Muchun Song authored
Just like assignment to ug->memcg, we only need to update ug->dummy_page if memcg changed. So move it to there. This is a very small optimization. Link: https://lkml.kernel.org/r/20210319163821.20704-5-songmuchun@bytedance.comSigned-off-by:
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Muchun Song authored
page_memcg() is not suitable for use by page_expected_state() and page_bad_reason(). Because it can BUG_ON() for the slab pages when CONFIG_DEBUG_VM is enabled. As neither lru, nor kmem, nor slab page should have anything left in there by the time the page is freed, what we care about is whether the value of page->memcg_data is 0. So just directly access page->memcg_data here. Link: https://lkml.kernel.org/r/20210319163821.20704-4-songmuchun@bytedance.comSigned-off-by:
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Muchun Song authored
We know that the unit of slab object charging is bytes, the unit of kmem page charging is PAGE_SIZE. If we want to reuse obj_cgroup APIs to charge the kmem pages, we should pass PAGE_SIZE (as third parameter) to obj_cgroup_charge(). Because the size is already PAGE_SIZE, we can skip touch the objcg stock. And obj_cgroup_{un}charge_pages() are introduced to charge in units of page level. In the latter patch, we also can reuse those two helpers to charge or uncharge a number of kernel pages to a object cgroup. This is just a code movement without any functional changes. Link: https://lkml.kernel.org/r/20210319163821.20704-3-songmuchun@bytedance.comSigned-off-by: -
Muchun Song authored
Patch series "Use obj_cgroup APIs to charge kmem pages", v5. Since Roman's series "The new cgroup slab memory controller" applied. All slab objects are charged with the new APIs of obj_cgroup. The new APIs introduce a struct obj_cgroup to charge slab objects. It prevents long-living objects from pinning the original memory cgroup in the memory. But there are still some corner objects (e.g. allocations larger than order-1 page on SLUB) which are not charged with the new APIs. Those objects (include the pages which are allocated from buddy allocator directly) are charged as kmem pages which still hold a reference to the memory cgroup. E.g. We know that the kernel stack is charged as kmem pages because the size of the kernel stack can be greater than 2 pages (e.g. 16KB on x86_64 or arm64). If we create a thread (suppose the thread stack is charged to memory cgroup A) and then move it from memory cgroup A to memory cgroup B. Because the kernel stack of the thread hold a reference to the memory cgroup A. The thread can pin the memory cgroup A in the memory even if we remove the cgroup A. If we want to see this scenario by using the following script. We can see that the system has added 500 dying cgroups (This is not a real world issue, just a script to show that the large kmallocs are charged as kmem pages which can pin the memory cgroup in the memory). #!/bin/bash cat /proc/cgroups | grep memory cd /sys/fs/cgroup/memory echo 1 > memory.move_charge_at_immigrate for i in range{1..500} do mkdir kmem_test echo $$ > kmem_test/cgroup.procs sleep 3600 & echo $$ > cgroup.procs echo `cat kmem_test/cgroup.procs` > cgroup.procs rmdir kmem_test done cat /proc/cgroups | grep memory This patchset aims to make those kmem pages to drop the reference to memory cgroup by using the APIs of obj_cgroup. Finally, we can see that the number of the dying cgroups will not increase if we run the above test script. This patch (of 7): The rcu_read_lock/unlock only can guarantee that the memcg will not be freed, but it cannot guarantee the success of css_get (which is in the refill_stock when cached memcg changed) to memcg. rcu_read_lock() memcg = obj_cgroup_memcg(old) __memcg_kmem_uncharge(memcg) refill_stock(memcg) if (stock->cached != memcg) // css_get can change the ref counter from 0 back to 1. css_get(&memcg->css) rcu_read_unlock() This fix is very like the commit: eefbfa7f ("mm: memcg/slab: fix use after free in obj_cgroup_charge") Fix this by holding a reference to the memcg which is passed to the __memcg_kmem_uncharge() before calling __memcg_kmem_uncharge(). Link: https://lkml.kernel.org/r/20210319163821.20704-1-songmuchun@bytedance.com Link: https://lkml.kernel.org/r/20210319163821.20704-2-songmuchun@bytedance.com Fixes: 3de7d4f2 ("mm: memcg/slab: optimize objcg stock draining") Signed-off-by: -
Shakeel Butt authored
Currently the kernel adds the page, allocated for swapin, to the swapcache before charging the page. This is fine but now we want a per-memcg swapcache stat which is essential for folks who wants to transparently migrate from cgroup v1's memsw to cgroup v2's memory and swap counters. In addition charging a page before exposing it to other parts of the kernel is a step in the right direction. To correctly maintain the per-memcg swapcache stat, this patch has adopted to charge the page before adding it to swapcache. One challenge in this option is the failure case of add_to_swap_cache() on which we need to undo the mem_cgroup_charge(). Specifically undoing mem_cgroup_uncharge_swap() is not simple. To resolve the issue, this patch decouples the charging for swapin pages from mem_cgroup_charge(). Two new functions are introduced, mem_cgroup_swapin_charge_page() for just charging the swapin page and mem_cgroup_swapin_uncharge_swap() for uncharging the swap slot once the page has been successfully added to the swapcache. [shakeelb@google.com: set page->private before calling swap_readpage] Link: https://lkml.kernel.org/r/20210318015959.2986837-1-shakeelb@google.com Link: https://lkml.kernel.org/r/20210305212639.775498-1-shakeelb@google.comSigned-off-by:
Hugh Dickins <hughd@google.com> Tested-by:
Heiko Carstens <hca@linux.ibm.com> Cc: Michal Hocko <mhocko@kernel.org> Cc: Stephen Rothwell <sfr@canb.auug.org.au> Cc: Christian Borntraeger <borntraeger@de.ibm.com> Signed-off-by:
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Johannes Weiner authored
With memcg having switched to rstat, memory.stat output is precise. Update the cgroup selftest to reflect the expectations and error tolerances of the new implementation. Also add newly tracked types of memory to the memory.stat side of the equation, since they're included in memory.current and could throw false positives. Link: https://lkml.kernel.org/r/20210209163304.77088-9-hannes@cmpxchg.orgSigned-off-by:
Michal Koutný <mkoutny@suse.com> Acked-by:
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Johannes Weiner authored
There are two functions to flush the per-cpu data of an lruvec into the rest of the cgroup tree: when the cgroup is being freed, and when a CPU disappears during hotplug. The difference is whether all CPUs or just one is being collected, but the rest of the flushing code is the same. Merge them into one function and share the common code. Link: https://lkml.kernel.org/r/20210209163304.77088-8-hannes@cmpxchg.orgSigned-off-by:
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Johannes Weiner authored
Replace the memory controller's custom hierarchical stats code with the generic rstat infrastructure provided by the cgroup core. The current implementation does batched upward propagation from the write side (i.e. as stats change). The per-cpu batches introduce an error, which is multiplied by the number of subgroups in a tree. In systems with many CPUs and sizable cgroup trees, the error can be large enough to confuse users (e.g. 32 batch pages * 32 CPUs * 32 subgroups results in an error of up to 128M per stat item). This can entirely swallow allocation bursts inside a workload that the user is expecting to see reflected in the statistics. In the past, we've done read-side aggregation, where a memory.stat read would have to walk the entire subtree and add up per-cpu counts. This became problematic with lazily-freed cgroups: we could have large subtrees where most cgroups were entirely idle. Hence the switch to change-driven upward propagation. Unfortunately, it needed to trade accuracy for speed due to the write side being so hot. Rstat combines the best of both worlds: from the write side, it cheaply maintains a queue of cgroups that have pending changes, so that the read side can do selective tree aggregation. This way the reported stats will always be precise and recent as can be, while the aggregation can skip over potentially large numbers of idle cgroups. The way rstat works is that it implements a tree for tracking cgroups with pending local changes, as well as a flush function that walks the tree upwards. The controller then drives this by 1) telling rstat when a local cgroup stat changes (e.g. mod_memcg_state) and 2) when a flush is required to get uptodate hierarchy stats for a given subtree (e.g. when memory.stat is read). The controller also provides a flush callback that is called during the rstat flush walk for each cgroup and aggregates its local per-cpu counters and propagates them upwards. This adds a second vmstats to struct mem_cgroup (MEMCG_NR_STAT + NR_VM_EVENT_ITEMS) to track pending subtree deltas during upward aggregation. It removes 3 words from the per-cpu data. It eliminates memcg_exact_page_state(), since memcg_page_state() is now exact. [akpm@linux-foundation.org: merge fix] [hannes@cmpxchg.org: fix a sleep in atomic section problem] Link: https://lkml.kernel.org/r/20210315234100.64307-1-hannes@cmpxchg.org Link: https://lkml.kernel.org/r/20210209163304.77088-7-hannes@cmpxchg.orgSigned-off-by:
Balbir Singh <bsingharora@gmail.com> Cc: Tejun Heo <tj@kernel.org> Signed-off-by:
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Johannes Weiner authored
Current users of the rstat code can source root-level statistics from the native counters of their respective subsystem, allowing them to forego aggregation at the root level. This optimization is currently implemented inside the generic rstat code, which doesn't track the root cgroup and doesn't invoke the subsystem flush callbacks on it. However, the memory controller cannot do this optimization, because cgroup1 breaks out memory specifically for the local level, including at the root level. In preparation for the memory controller switching to rstat, move the optimization from rstat core to the controllers. Afterwards, rstat will always track the root cgroup for changes and invoke the subsystem callbacks on it; and it's up to the subsystem to special-case and skip aggregation of the root cgroup if it can source this information through other, cheaper means. This is the case for the io controller and the cgroup base stats. In their respective flush callbacks, check whether the parent is the root cgroup, and if so, skip the unnecessary upward propagation. The extra cost of tracking the root cgroup is negligible: on stat changes, we actually remove a branch that checks for the root. The queueing for a flush touches only per-cpu data, and only the first stat change since a flush requires a (per-cpu) lock. Link: https://lkml.kernel.org/r/20210209163304.77088-6-hannes@cmpxchg.orgSigned-off-by:
Tejun Heo <tj@kernel.org> Cc: Michal Hocko <mhocko@suse.com> Cc: Michal Koutný <mkoutny@suse.com> Cc: Roman Gushchin <guro@fb.com> Cc: Shakeel Butt <shakeelb@google.com> Signed-off-by:
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Johannes Weiner authored
Rstat currently only supports the default hierarchy in cgroup2. In order to replace memcg's private stats infrastructure - used in both cgroup1 and cgroup2 - with rstat, the latter needs to support cgroup1. The initialization and destruction callbacks for regular cgroups are already in place. Remove the cgroup_on_dfl() guards to handle cgroup1. The initialization of the root cgroup is currently hardcoded to only handle cgrp_dfl_root.cgrp. Move those callbacks to cgroup_setup_root() and cgroup_destroy_root() to handle the default root as well as the various cgroup1 roots we may set up during mounting. The linking of css to cgroups happens in code shared between cgroup1 and cgroup2 as well. Simply remove the cgroup_on_dfl() guard. Linkage of the root css to the root cgroup is a bit trickier: per default, the root css of a subsystem controller belongs to the default hierarchy (i.e. the cgroup2 root). When a controller is mounted in its cgroup1 version, the root css is stolen and moved to the cgroup1 root; on unmount, the css moves back to the default hierarchy. Annotate rebind_subsystems() to move the root css linkage along between roots. Link: https://lkml.kernel.org/r/20210209163304.77088-5-hannes@cmpxchg.orgSigned-off-by:
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Johannes Weiner authored
There are no users outside of the memory controller itself. The rest of the kernel cares either about node or lruvec stats. Link: https://lkml.kernel.org/r/20210209163304.77088-4-hannes@cmpxchg.orgSigned-off-by:
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Johannes Weiner authored
No need to encapsulate a simple struct member access. Link: https://lkml.kernel.org/r/20210209163304.77088-3-hannes@cmpxchg.orgSigned-off-by:
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Johannes Weiner authored
Patch series "mm: memcontrol: switch to rstat", v3. This series converts memcg stats tracking to the streamlined rstat infrastructure provided by the cgroup core code. rstat is already used by the CPU controller and the IO controller. This change is motivated by recent accuracy problems in memcg's custom stats code, as well as the benefits of sharing common infra with other controllers. The current memcg implementation does batched tree aggregation on the write side: local stat changes are cached in per-cpu counters, which are then propagated upward in batches when a threshold (32 pages) is exceeded. This is cheap, but the error introduced by the lazy upward propagation adds up: 32 pages times CPUs times cgroups in the subtree. We've had complaints from service owners that the stats do not reliably track and react to allocation behavior as expected, sometimes swallowing the results of entire test applications. The original memcg stat implementation used to do tree aggregation exclusively on the read side: local stats would only ever be tracked in per-cpu counters, and a memory.stat read would iterate the entire subtree and sum those counters up. This didn't keep up with the times: - Cgroup trees are much bigger now. We switched to lazily-freed cgroups, where deleted groups would hang around until their remaining page cache has been reclaimed. This can result in large subtrees that are expensive to walk, while most of the groups are idle and their statistics don't change much anymore. - Automated monitoring increased. With the proliferation of userspace oom killing, proactive reclaim, and higher-resolution logging of workload trends in general, top-level stat files are polled at least once a second in many deployments. - The lifetime of cgroups got shorter. Where most cgroup setups in the past would have a few large policy-oriented cgroups for everything running on the system, newer cgroup deployments tend to create one group per application - which gets deleted again as the processes exit. An aggregation scheme that doesn't retain child data inside the parents loses event history of the subtree. Rstat addresses all three of those concerns through intelligent, persistent read-side aggregation. As statistics change at the local level, rstat tracks - on a per-cpu basis - only those parts of a subtree that have changes pending and require aggregation. The actual aggregation occurs on the colder read side - which can now skip over (potentially large) numbers of recently idle cgroups. === The test_kmem cgroup selftest is currently failing due to excessive cumulative vmstat drift from 100 subgroups: ok 1 test_kmem_basic memory.current = 8810496 slab + anon + file + kernel_stack = 17074568 slab = 6101384 anon = 946176 file = 0 kernel_stack = 10027008 not ok 2 test_kmem_memcg_deletion ok 3 test_kmem_proc_kpagecgroup ok 4 test_kmem_kernel_stacks ok 5 test_kmem_dead_cgroups ok 6 test_percpu_basic As you can see, memory.stat items far exceed memory.current. The kernel stack alone is bigger than all of charged memory. That's because the memory of the test has been uncharged from memory.current, but the negative vmstat deltas are still sitting in the percpu caches. The test at this time isn't even counting percpu, pagetables etc. yet, which would further contribute to the error. The last patch in the series updates the test to include them - as well as reduces the vmstat tolerances in general to only expect page_counter batching. With all patches applied, the (now more stringent) test succeeds: ok 1 test_kmem_basic ok 2 test_kmem_memcg_deletion ok 3 test_kmem_proc_kpagecgroup ok 4 test_kmem_kernel_stacks ok 5 test_kmem_dead_cgroups ok 6 test_percpu_basic === A kernel build test confirms that overhead is comparable. Two kernels are built simultaneously in a nested tree with several idle siblings: root - kernelbuild - one - two - three - four - build-a (defconfig, make -j16) `- build-b (defconfig, make -j16) `- idle-1 `- ... `- idle-9 During the builds, kernelbuild/memory.stat is read once a second. A perf diff shows that the changes in cycle distribution is minimal. Top 10 kernel symbols: 0.09% +0.08% [kernel.kallsyms] [k] __mod_memcg_lruvec_state 0.00% +0.06% [kernel.kallsyms] [k] cgroup_rstat_updated 0.08% -0.05% [kernel.kallsyms] [k] __mod_memcg_state.part.0 0.16% -0.04% [kernel.kallsyms] [k] release_pages 0.00% +0.03% [kernel.kallsyms] [k] __count_memcg_events 0.01% +0.03% [kernel.kallsyms] [k] mem_cgroup_charge_statistics.constprop.0 0.10% -0.02% [kernel.kallsyms] [k] get_mem_cgroup_from_mm 0.05% -0.02% [kernel.kallsyms] [k] mem_cgroup_update_lru_size 0.57% +0.01% [kernel.kallsyms] [k] asm_exc_page_fault === The on-demand aggregated stats are now fully accurate: $ grep -e nr_inactive_file /proc/vmstat | awk '{print($1,$2*4096)}'; \ grep -e inactive_file /sys/fs/cgroup/memory.stat vanilla: patched: nr_inactive_file 1574105088 nr_inactive_file 1027801088 inactive_file 1577410560 inactive_file 1027801088 === This patch (of 8): The memcg hotunplug callback erroneously flushes counts on the local CPU, not the counts of the CPU going away; those counts will be lost. Flush the CPU that is actually going away. Also simplify the code a bit by using mod_memcg_state() and count_memcg_events() instead of open-coding the upward flush - this is comparable to how vmstat.c handles hotunplug flushing. Link: https://lkml.kernel.org/r/20210209163304.77088-1-hannes@cmpxchg.org Link: https://lkml.kernel.org/r/20210209163304.77088-2-hannes@cmpxchg.org Fixes: a983b5eb ("mm: memcontrol: fix excessive complexity in memory.stat reporting") Signed-off-by: -
Shakeel Butt authored
In the era of async memcg oom-killer, the commit a0d8b00a ("mm: memcg: do not declare OOM from __GFP_NOFAIL allocations") added the code to skip memcg oom-killer for __GFP_NOFAIL allocations. The reason was that the __GFP_NOFAIL callers will not enter aync oom synchronization path and will keep the task marked as in memcg oom. At that time the tasks marked in memcg oom can bypass the memcg limits and the oom synchronization would have happened later in the later userspace triggered page fault. Thus letting the task marked as under memcg oom bypass the memcg limit for arbitrary time. With the synchronous memcg oom-killer (commit 29ef680a ("memcg, oom: move out_of_memory back to the charge path")) and not letting the task marked under memcg oom to bypass the memcg limits (commit 1f14c1ac ("mm: memcg: do not allow task about to OOM kill to bypass the limit")), we can again allow __GFP_NOFAIL allocations to trigger memcg oom-kill. This will make memcg oom behavior closer to page allocator oom behavior. Link: https://lkml.kernel.org/r/20210223204337.2785120-1-shakeelb@google.comSigned-off-by:
David Rientjes <rientjes@google.com> Signed-off-by:
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Shakeel Butt authored
Replace the implicit checking of root memcg with explicit root memcg checking i.e. !css->parent with mem_cgroup_is_root(). Link: https://lkml.kernel.org/r/20210223205625.2792891-1-shakeelb@google.comSigned-off-by:
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Muchun Song authored
For simplification commit 991e7673 ("mm: memcontrol: account kernel stack per node") changed the per zone vmalloc backed stack pages accounting to per node. By doing that we have lost a certain precision because those pages might live in different NUMA nodes. In the end NR_KERNEL_STACK_KB exported to the userspace might be over estimated on some nodes while underestimated on others. But this is not a real world problem, just a problem found by reading the code. So there is no actual data to showing how much impact it has on users. This doesn't impose any real problem to correctnes of the kernel behavior as the counter is not used for any internal processing but it can cause some confusion to the userspace. Address the problem by accounting each vmalloc backing page to its own node. Link: https://lkml.kernel.org/r/20210303151843.81156-1-songmuchun@bytedance.comSigned-off-by:
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Zhiyuan Dai authored
Replace /* */ comment with //, fix SPDX comment style. see: Documentation/process/license-rules.rst Link: https://lkml.kernel.org/r/1614223348-15516-1-git-send-email-daizhiyuan@phytium.com.cnSigned-off-by:
Zhiyuan Dai <daizhiyuan@phytium.com.cn> Signed-off-by:
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Yang Shi authored
Since commit 5a52c9df ("uprobe: use FOLL_SPLIT_PMD instead of FOLL_SPLIT") and commit ba925fa3 ("s390/gmap: improve THP splitting") FOLL_SPLIT has not been used anymore. Remove the dead code. Link: https://lkml.kernel.org/r/20210330203900.9222-1-shy828301@gmail.comSigned-off-by:
Yang Shi <shy828301@gmail.com> Reviewed-by:
John Hubbard <jhubbard@nvidia.com> Reviewed-by:
Jason Gunthorpe <jgg@nvidia.com> Signed-off-by:
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Joao Martins authored
Use the newly added unpin_user_page_range_dirty_lock() for more quickly unpinning a consecutive range of pages represented as compound pages. This will also calculate number of pages to unpin (for the tail pages which matching head page) and thus batch the refcount update. Running a test program which calls memory range reg/unreg on a region 1G in size and measures cost of both operations together (in a guest using rxe) with THP and hugetlbfs: Before: 590 rounds in 5.003 sec: 8480.335 usec / round 6898 rounds in 60.001 sec: 8698.367 usec / round After: 2688 rounds in 5.002 sec: 1860.786 usec / round 32517 rounds in 60.001 sec: 1845.225 usec / round Link: https://lkml.kernel.org/r/20210212130843.13865-5-joao.m.martins@oracle.comSigned-off-by:
Joao Martins <joao.m.martins@oracle.com> Acked-by:
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Joao Martins authored
Add an unpin_user_page_range_dirty_lock() API which takes a starting page and how many consecutive pages we want to unpin and optionally dirty. To that end, define another iterator for_each_compound_range() that operates in page ranges as opposed to page array. For users (like RDMA mr_dereg) where each sg represents a contiguous set of pages, we're able to more efficiently unpin pages without having to supply an array of pages much of what happens today with unpin_user_pages(). Link: https://lkml.kernel.org/r/20210212130843.13865-4-joao.m.martins@oracle.comSuggested-by:
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Joao Martins authored
Rather than decrementing the head page refcount one by one, we walk the page array and checking which belong to the same compound_head. Later on we decrement the calculated amount of references in a single write to the head page. To that end switch to for_each_compound_head() does most of the work. set_page_dirty() needs no adjustment as it's a nop for non-dirty head pages and it doesn't operate on tail pages. This considerably improves unpinning of pages with THP and hugetlbfs: - THP gup_test -t -m 16384 -r 10 [-L|-a] -S -n 512 -w PIN_LONGTERM_BENCHMARK (put values): ~87.6k us -> ~23.2k us - 16G with 1G huge page size gup_test -f /mnt/huge/file -m 16384 -r 10 [-L|-a] -S -n 512 -w PIN_LONGTERM_BENCHMARK: (put values): ~87.6k us -> ~27.5k us Link: https://lkml.kernel.org/r/20210212130843.13865-3-joao.m.martins@oracle.comSigned-off-by:
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Joao Martins authored
Patch series "mm/gup: page unpining improvements", v4. This series improves page unpinning, with an eye on improving MR deregistration for big swaths of memory (which is bound by the page unpining), particularly: 1) Decrement the head page by @ntails and thus reducing a lot the number of atomic operations per compound page. This is done by comparing individual tail pages heads, and counting number of consecutive tails on which they match heads and based on that update head page refcount. Should have a visible improvement in all page (un)pinners which use compound pages 2) Introducing a new API for unpinning page ranges (to avoid the trick in the previous item and be based on math), and use that in RDMA ib_mem_release (used for mr deregistration). Performance improvements: unpin_user_pages() for hugetlbfs and THP improves ~3x (through gup_test) and RDMA MR dereg improves ~4.5x with the new API. See patches 2 and 4 for those. This patch (of 4): Add a helper that iterates over head pages in a list of pages. It essentially counts the tails until the next page to process has a different head that the current. This is going to be used by unpin_user_pages() family of functions, to batch the head page refcount updates once for all passed consecutive tail pages. Link: https://lkml.kernel.org/r/20210212130843.13865-1-joao.m.martins@oracle.com Link: https://lkml.kernel.org/r/20210212130843.13865-2-joao.m.martins@oracle.comSigned-off-by:
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Nikita Ermakov authored
If an unmapped region was found and the flag is MS_ASYNC (without MS_INVALIDATE) there is nothing to do and the result would be always -ENOMEM, so return immediately. Link: https://lkml.kernel.org/r/20201025092901.56399-1-sh1r4s3@mail.si-head.nlSigned-off-by:
Nikita Ermakov <sh1r4s3@mail.si-head.nl> Cc: Vlastimil Babka <vbabka@suse.cz> Signed-off-by:
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Rui Sun authored
Commit a6de4b48 ("mm: convert find_get_entry to return the head page") uses @index instead of @offset, but the comment is stale, update it. Link: https://lkml.kernel.org/r/1617948260-50724-1-git-send-email-zhangshaokun@hisilicon.comSigned-off-by:
Rui Sun <sunrui26@huawei.com> Signed-off-by:
Shaokun Zhang <zhangshaokun@hisilicon.com> Cc: Matthew Wilcox (Oracle) <willy@infradead.org> Signed-off-by:
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Matthew Wilcox (Oracle) authored
page_mapping_file() is only used by some architectures, and then it is usually only used in one place. Make it a static inline function so other architectures don't have to carry this dead code. Link: https://lkml.kernel.org/r/20210317123011.350118-1-willy@infradead.orgSigned-off-by:
Matthew Wilcox (Oracle) <willy@infradead.org> Reviewed-by:
David Hildenbrand <david@redhat.com> Acked-by:
Mike Rapoport <rppt@linux.ibm.com> Cc: Huang Ying <ying.huang@intel.com> Signed-off-by:
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Johannes Weiner authored
Page writeback doesn't hold a page reference, which allows truncate to free a page the second PageWriteback is cleared. This used to require special attention in test_clear_page_writeback(), where we had to be careful not to rely on the unstable page->memcg binding and look up all the necessary information before clearing the writeback flag. Since commit 073861ed ("mm: fix VM_BUG_ON(PageTail) and BUG_ON(PageWriteback)") test_clear_page_writeback() is called with an explicit reference on the page, and this dance is no longer needed. Use unlock_page_memcg() and dec_lruvec_page_state() directly. This removes the last user of the lock_page_memcg() return value, change it to void. Touch up the comments in there as well. This also removes the last extern user of __unlock_page_memcg(), make it static. Further, it removes the last user of dec_lruvec_state(), delete it, along with a few other unused helpers. Link: https://lkml.kernel.org/r/YCQbYAWg4nvBFL6h@cmpxchg.orgSigned-off-by:
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Matthew Wilcox (Oracle) authored
If the I/O completed successfully, the page will remain Uptodate, even if it is subsequently truncated. If the I/O completed with an error, this check would cause us to retry the I/O if the page were truncated before we woke up. There is no need to retry the I/O; the I/O to fill the page failed, so we can legitimately just return -EIO. This code was originally added by commit 56f0d5fe6851 ("[PATCH] readpage-vs-invalidate fix") in 2005 (this commit ID is from the linux-fullhistory tree; it is also commit ba1f08f1 in tglx-history). At the time, truncate_complete_page() called ClearPageUptodate(), and so this was fixing a real bug. In 2008, commit 84209e02 ("mm: dont clear PG_uptodate on truncate/invalidate") removed the call to ClearPageUptodate, and this check has been unnecessary ever since. It doesn't do any real harm, but there's no need to keep it. Link: https://lkml.kernel.org/r/20210303222547.1056428-1-willy@infradead.orgSigned-off-by:William Kucharski <william.kucharski@oracle.com> Signed-off-by:
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Matthew Wilcox (Oracle) authored
After splitting generic_file_buffered_read() into smaller parts, it turns out we can reuse one of the parts in filemap_fault(). This fixes an oversight -- waiting for the I/O to complete is now interruptible by a fatal signal. And it saves us a few bytes of text in an unlikely path. $ ./scripts/bloat-o-meter before.o after.o add/remove: 0/0 grow/shrink: 0/1 up/down: 0/-207 (-207) Function old new delta filemap_fault 2187 1980 -207 Total: Before=37491, After=37284, chg -0.55% Link: https://lkml.kernel.org/r/20210226140011.2883498-1-willy@infradead.orgSigned-off-by:
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Jens Axboe authored
For reads, use the better variant of checking for the need to call filemap_write_and_wait_range() when doing O_DIRECT. This avoids falling back to the slow path for IOCB_NOWAIT, if there are no pages to wait for (or write out). Link: https://lkml.kernel.org/r/20210224164455.1096727-4-axboe@kernel.dkSigned-off-by:
Jens Axboe <axboe@kernel.dk> Reviewed-by:
Jan Kara <jack@suse.cz> Cc: Matthew Wilcox (Oracle) <willy@infradead.org> Signed-off-by:
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Jens Axboe authored
For the generic page cache read helper, use the better variant of checking for the need to call filemap_write_and_wait_range() when doing O_DIRECT reads. This avoids falling back to the slow path for IOCB_NOWAIT, if there are no pages to wait for (or write out). Link: https://lkml.kernel.org/r/20210224164455.1096727-3-axboe@kernel.dkSigned-off-by:
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Jens Axboe authored
Patch series "Improve IOCB_NOWAIT O_DIRECT reads", v3. An internal workload complained because it was using too much CPU, and when I took a look, we had a lot of io_uring workers going to town. For an async buffered read like workload, I am normally expecting _zero_ offloads to a worker thread, but this one had tons of them. I'd drop caches and things would look good again, but then a minute later we'd regress back to using workers. Turns out that every minute something was reading parts of the device, which would add page cache for that inode. I put patches like these in for our kernel, and the problem was solved. Don't -EAGAIN IOCB_NOWAIT dio reads just because we have page cache entries for the given range. This causes unnecessary work from the callers side, when the IO could have been issued totally fine without blocking on writeback when there is none. This patch (of 3): For O_DIRECT reads/writes, we check if we need to issue a call to filemap_write_and_wait_range() to issue and/or wait for writeback for any page in the given range. The existing mechanism just checks for a page in the range, which is suboptimal for IOCB_NOWAIT as we'll fallback to the slow path (and needing retry) if there's just a clean page cache page in the range. Provide filemap_range_needs_writeback() which tries a little harder to check if we actually need to issue and/or wait for writeback in the range. Link: https://lkml.kernel.org/r/20210224164455.1096727-1-axboe@kernel.dk Link: https://lkml.kernel.org/r/20210224164455.1096727-2-axboe@kernel.dkSigned-off-by:
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Anshuman Khandual authored
early_memtest() does not get called from all architectures. Hence enabling CONFIG_MEMTEST and providing a valid memtest=[1..N] kernel command line option might not trigger the memory pattern tests as would be expected in normal circumstances. This situation is misleading. The change here prevents the above mentioned problem after introducing a new config option ARCH_USE_MEMTEST that should be subscribed on platforms that call early_memtest(), in order to enable the config CONFIG_MEMTEST. Conversely CONFIG_MEMTEST cannot be enabled on platforms where it would not be tested anyway. Link: https://lkml.kernel.org/r/1617269193-22294-1-git-send-email-anshuman.khandual@arm.comSigned-off-by:
Anshuman Khandual <anshuman.khandual@arm.com> Acked-by: Catalin Marinas <catalin.marinas@arm.com> (arm64) Reviewed-by:
Max Filippov <jcmvbkbc@gmail.com> Cc: Russell King <linux@armlinux.org.uk> Cc: Will Deacon <will@kernel.org> Cc: Thomas Bogendoerfer <tsbogend@alpha.franken.de> Cc: Michael Ellerman <mpe@ellerman.id.au> Cc: Benjamin Herrenschmidt <benh@kernel.crashing.org> Cc: Paul Mackerras <paulus@samba.org> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: Ingo Molnar <mingo@redhat.com> Cc: Chris Zankel <chris@zankel.net> Signed-off-by:
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Sergei Trofimovich authored
When page_poison detects page corruption it's useful to see who freed a page recently to have a guess where write-after-free corruption happens. After this change corruption report has extra page data. Example report from real corruption (includes only page_pwner part): pagealloc: memory corruption e00000014cd61d10: 11 00 00 00 00 00 00 00 30 1d d2 ff ff 0f 00 60 ........0......` e00000014cd61d20: b0 1d d2 ff ff 0f 00 60 90 fe 1c 00 08 00 00 20 .......`....... ... CPU: 1 PID: 220402 Comm: cc1plus Not tainted 5.12.0-rc5-00107-g9720c6f59ecf #245 Hardware name: hp server rx3600, BIOS 04.03 04/08/2008 ... Call Trace: [<a000000100015210>] show_stack+0x90/0xc0 [<a000000101163390>] dump_stack+0x150/0x1c0 [<a0000001003f1e90>] __kernel_unpoison_pages+0x410/0x440 [<a0000001003c2460>] get_page_from_freelist+0x1460/0x2ca0 [<a0000001003c6be0>] __alloc_pages_nodemask+0x3c0/0x660 [<a0000001003ed690>] alloc_pages_vma+0xb0/0x500 [<a00000010037deb0>] __handle_mm_fault+0x1230/0x1fe0 [<a00000010037ef70>] handle_mm_fault+0x310/0x4e0 [<a00000010005dc70>] ia64_do_page_fault+0x1f0/0xb80 [<a00000010000ca00>] ia64_leave_kernel+0x0/0x270 page_owner tracks the page as freed page allocated via order 0, migratetype Movable, gfp_mask 0x100dca(GFP_HIGHUSER_MOVABLE|__GFP_ZERO), pid 37, ts 8173444098740 __reset_page_owner+0x40/0x200 free_pcp_prepare+0x4d0/0x600 free_unref_page+0x20/0x1c0 __put_page+0x110/0x1a0 migrate_pages+0x16d0/0x1dc0 compact_zone+0xfc0/0x1aa0 proactive_compact_node+0xd0/0x1e0 kcompactd+0x550/0x600 kthread+0x2c0/0x2e0 call_payload+0x50/0x80 Here we can see that page was freed by page migration but something managed to write to it afterwards. [slyfox@gentoo.org: s/dump_page_owner/dump_page/, per Vlastimil] Link: https://lkml.kernel.org/r/20210407230800.1086854-1-slyfox@gentoo.org Link: https://lkml.kernel.org/r/20210404141735.2152984-1-slyfox@gentoo.orgSigned-off-by:Sergei Trofimovich <slyfox@gentoo.org> Acked-by:
Vlastimil Babka <vbabka@suse.cz> Signed-off-by:
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Sergei Trofimovich authored
Before the change page_owner recursion was detected via fetching backtrace and inspecting it for current instruction pointer. It has a few problems: - it is slightly slow as it requires extra backtrace and a linear stack scan of the result - it is too late to check if backtrace fetching required memory allocation itself (ia64's unwinder requires it). To simplify recursion tracking let's use page_owner recursion flag in 'struct task_struct'. The change make page_owner=on work on ia64 by avoiding infinite recursion in: kmalloc() -> __set_page_owner() -> save_stack() -> unwind() [ia64-specific] -> build_script() -> kmalloc() -> __set_page_owner() [we short-circuit here] -> save_stack() -> unwind() [recursion] Link: https://lkml.kernel.org/r/20210402115342.1463781-1-slyfox@gentoo.orgSigned-off-by:
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Sergei Trofimovich authored
I tried to use page_owner=1 for a while noticed too late it had no effect as opposed to similar init_on_alloc=1 (these work). Let's make them consistent. The change decreses binary size slightly: text data bss dec hex filename 12408 321 17 12746 31ca mm/page_owner.o.before 12320 321 17 12658 3172 mm/page_owner.o.after Link: https://lkml.kernel.org/r/20210401210909.3532086-1-slyfox@gentoo.orgSigned-off-by:
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Sergei Trofimovich authored
Very minor optimization. Link: https://lkml.kernel.org/r/20210401212445.3534721-1-slyfox@gentoo.orgSigned-off-by:
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