* embedding these tags into addresses that point to these memory regions, and
* checking that the memory and the pointer tags match on memory accesses)
* redefine this macro to strip tags from pointers.
- * It's defined as noop for arcitectures that don't support memory tagging.
+ * It's defined as noop for architectures that don't support memory tagging.
*/
#ifndef untagged_addr
#define untagged_addr(addr) (addr)
*
* If IS_ENABLED(CONFIG_KASAN_VMALLOC), VM_KASAN is set on a vm_struct after
* shadow memory has been mapped. It's used to handle allocation errors so that
- * we don't try to poision shadow on free if it was never allocated.
+ * we don't try to poison shadow on free if it was never allocated.
*
* Otherwise, VM_KASAN is set for kasan_module_alloc() allocations and used to
* determine which allocations need the module shadow freed.
/*
* Maximum alignment for ioremap() regions.
- * Can be overriden by arch-specific value.
+ * Can be overridden by arch-specific value.
*/
#ifndef IOREMAP_MAX_ORDER
#define IOREMAP_MAX_ORDER (7 + PAGE_SHIFT) /* 128 pages */
/**
* balloon_page_list_dequeue() - removes pages from balloon's page list and
* returns a list of the pages.
- * @b_dev_info: balloon device decriptor where we will grab a page from.
+ * @b_dev_info: balloon device descriptor where we will grab a page from.
* @pages: pointer to the list of pages that would be returned to the caller.
* @n_req_pages: number of requested pages.
*
/*
* balloon_page_dequeue - removes a page from balloon's page list and returns
* its address to allow the driver to release the page.
- * @b_dev_info: balloon device decriptor where we will grab a page from.
+ * @b_dev_info: balloon device descriptor where we will grab a page from.
*
* Driver must call this function to properly dequeue a previously enqueued page
* before definitively releasing it back to the guest system.
unsigned int wmark_low;
/*
- * Cap the low watermak to avoid excessive compaction
- * activity in case a user sets the proactivess tunable
+ * Cap the low watermark to avoid excessive compaction
+ * activity in case a user sets the proactiveness tunable
* close to 100 (maximum).
*/
wmark_low = max(100U - sysctl_compaction_proactiveness, 5U);
* entirely memory-based such as tmpfs, and filesystems which support
* unwritten extents.
*
- * Return: The requested offset on successs, or -ENXIO if @whence specifies
+ * Return: The requested offset on success, or -ENXIO if @whence specifies
* SEEK_DATA and there is no data after @start. There is an implicit hole
* after @end - 1, so SEEK_HOLE returns @end if all the bytes between @start
* and @end contain data.
* Returns NULL on any kind of failure - a hole must then be inserted into
* the corefile, to preserve alignment with its headers; and also returns
* NULL wherever the ZERO_PAGE, or an anonymous pte_none, has been found -
- * allowing a hole to be left in the corefile to save diskspace.
+ * allowing a hole to be left in the corefile to save disk space.
*
* Called without mmap_lock (takes and releases the mmap_lock by itself).
*/
/*
* Disable migration so resulting virtual address is stable
- * accross preemption.
+ * across preemption.
*/
migrate_disable();
preempt_disable();
/*
* Returns
* - 0 if PMD could not be locked
- * - 1 if PMD was locked but protections unchange and TLB flush unnecessary
- * - HPAGE_PMD_NR is protections changed and TLB flush necessary
+ * - 1 if PMD was locked but protections unchanged and TLB flush unnecessary
+ * - HPAGE_PMD_NR if protections changed and TLB flush necessary
*/
int change_huge_pmd(struct vm_area_struct *vma, pmd_t *pmd,
unsigned long addr, pgprot_t newprot, unsigned long cp_flags)
xa_lock(&swap_cache->i_pages);
}
- /* lock lru list/PageCompound, ref freezed by page_ref_freeze */
+ /* lock lru list/PageCompound, ref frozen by page_ref_freeze */
lruvec = lock_page_lruvec(head);
for (i = nr - 1; i >= 1; i--) {
resv->region_cache_count;
/* At this point, we should have enough entries in the cache
- * for all the existings adds_in_progress. We should only be
+ * for all the existing adds_in_progress. We should only be
* needing to allocate for regions_needed.
*/
VM_BUG_ON(resv->region_cache_count < resv->adds_in_progress);
v_end = ALIGN_DOWN(vma->vm_end, PUD_SIZE);
/*
- * vma need span at least one aligned PUD size and the start,end range
- * must at least partialy within it.
+ * vma needs to span at least one aligned PUD size, and the range
+ * must be at least partially within in.
*/
if (!(vma->vm_flags & VM_MAYSHARE) || !(v_end > v_start) ||
(*end <= v_start) || (*start >= v_end))
}
/*
- * Stack area - atomatically grows in one direction
+ * Stack area - automatically grows in one direction
*
* VM_GROWSUP / VM_GROWSDOWN VMAs are always private anonymous:
* do_mmap() forbids all other combinations.
#define KASAN_TAG_MAX 0xFD /* maximum value for random tags */
#ifdef CONFIG_KASAN_HW_TAGS
-#define KASAN_TAG_MIN 0xF0 /* mimimum value for random tags */
+#define KASAN_TAG_MIN 0xF0 /* minimum value for random tags */
#else
-#define KASAN_TAG_MIN 0x00 /* mimimum value for random tags */
+#define KASAN_TAG_MIN 0x00 /* minimum value for random tags */
#endif
#ifdef CONFIG_KASAN_GENERIC
#else /* CONFIG_KASAN_HW_TAGS */
/**
- * kasan_poison - mark the memory range as unaccessible
+ * kasan_poison - mark the memory range as inaccessible
* @addr - range start address, must be aligned to KASAN_GRANULE_SIZE
* @size - range size, must be aligned to KASAN_GRANULE_SIZE
* @value - value that's written to metadata for the range
/**
* kasan_poison_last_granule - mark the last granule of the memory range as
- * unaccessible
+ * inaccessible
* @addr - range start address, must be aligned to KASAN_GRANULE_SIZE
* @size - range size
*
/* Data structure and operations for quarantine queues. */
/*
- * Each queue is a signle-linked list, which also stores the total size of
+ * Each queue is a single-linked list, which also stores the total size of
* objects inside of it.
*/
struct qlist_head {
local_irq_save(flags);
/*
- * As the object now gets freed from the quaratine, assume that its
+ * As the object now gets freed from the quarantine, assume that its
* free track is no longer valid.
*/
*(u8 *)kasan_mem_to_shadow(object) = KASAN_KMALLOC_FREE;
* // rest of vmalloc process <data dependency>
* STORE p, a LOAD shadow(x+99)
*
- * If there is no barrier between the end of unpoisioning the shadow
+ * If there is no barrier between the end of unpoisoning the shadow
* and the store of the result to p, the stores could be committed
* in a different order by CPU#0, and CPU#1 could erroneously observe
* poison in the shadow.
* How does this work?
* -------------------
*
- * We have a region that is page aligned, labelled as A.
+ * We have a region that is page aligned, labeled as A.
* That might not map onto the shadow in a way that is page-aligned:
*
* start end
if (panic_on_warn)
panic("panic_on_warn set ...\n");
- /* We encountered a memory unsafety error, taint the kernel! */
+ /* We encountered a memory safety error, taint the kernel! */
add_taint(TAINT_BAD_PAGE, LOCKDEP_STILL_OK);
}
*
* The page table that maps the page has been already unlinked
* from the page table tree and this process cannot get
- * an additinal pin on the page.
+ * an additional pin on the page.
*
* New pins can come later if the page is shared across fork,
* but not from this process. The other process cannot write to
/*
* Ok this is tricky, when get_user_pages_fast() run it doesn't
* take any lock, therefore the check that we are going to make
- * with the pagecount against the mapcount is racey and
+ * with the pagecount against the mapcount is racy and
* O_DIRECT can happen right after the check.
* So we clear the pte and flush the tlb before the check
* this assure us that no O_DIRECT can happen after the check
*/
*_stable_node = found;
/*
- * Just for robustneess as stable_node is
+ * Just for robustness, as stable_node is
* otherwise left as a stable pointer, the
* compiler shall optimize it away at build
* time.
if (end > vma->vm_end) {
/*
* Don't fail if end > vma->vm_end. If the old
- * vma was splitted while the mmap_lock was
+ * vma was split while the mmap_lock was
* released the effect of the concurrent
* operation may not cause madvise() to
* have an undefined result. There may be an
* MADV_DODUMP - cancel MADV_DONTDUMP: no longer exclude from core dump.
* MADV_COLD - the application is not expected to use this memory soon,
* deactivate pages in this range so that they can be reclaimed
- * easily if memory pressure hanppens.
+ * easily if memory pressure happens.
* MADV_PAGEOUT - the application is not expected to use this memory soon,
* page out the pages in this range immediately.
*
#define MEMFILE_PRIVATE(x, val) ((x) << 16 | (val))
#define MEMFILE_TYPE(val) ((val) >> 16 & 0xffff)
#define MEMFILE_ATTR(val) ((val) & 0xffff)
-/* Used for OOM nofiier */
+/* Used for OOM notifier */
#define OOM_CONTROL (0)
/*
* __count_memcg_events - account VM events in a cgroup
* @memcg: the memory cgroup
* @idx: the event item
- * @count: the number of events that occured
+ * @count: the number of events that occurred
*/
void __count_memcg_events(struct mem_cgroup *memcg, enum vm_event_item idx,
unsigned long count)
rcu_read_lock();
do {
/*
- * Page cache insertions can happen withou an
+ * Page cache insertions can happen without an
* actual mm context, e.g. during disk probing
* on boot, loopback IO, acct() writes etc.
*/
struct mem_cgroup *iter;
/*
- * Be careful about under_oom underflows becase a child memcg
+ * Be careful about under_oom underflows because a child memcg
* could have been added after mem_cgroup_mark_under_oom.
*/
spin_lock(&memcg_oom_lock);
/*
* There is no guarantee that an OOM-lock contender
* sees the wakeups triggered by the OOM kill
- * uncharges. Wake any sleepers explicitely.
+ * uncharges. Wake any sleepers explicitly.
*/
memcg_oom_recover(memcg);
}
* Foreign dirty flushing
*
* There's an inherent mismatch between memcg and writeback. The former
- * trackes ownership per-page while the latter per-inode. This was a
+ * tracks ownership per-page while the latter per-inode. This was a
* deliberate design decision because honoring per-page ownership in the
* writeback path is complicated, may lead to higher CPU and IO overheads
* and deemed unnecessary given that write-sharing an inode across
* triggering background writeback. A will be slowed down without a way to
* make writeback of the dirty pages happen.
*
- * Conditions like the above can lead to a cgroup getting repatedly and
+ * Conditions like the above can lead to a cgroup getting repeatedly and
* severely throttled after making some progress after each
- * dirty_expire_interval while the underyling IO device is almost
+ * dirty_expire_interval while the underlying IO device is almost
* completely idle.
*
* Solving this problem completely requires matching the ownership tracking
return 0;
/*
- * We are now commited to this value whatever it is. Changes in this
+ * We are now committed to this value whatever it is. Changes in this
* tunable will only affect upcoming migrations, not the current one.
* So we need to save it, and keep it going.
*/
if (dissolve_free_huge_page(page) || !take_page_off_buddy(page))
/*
* We could fail to take off the target page from buddy
- * for example due to racy page allocaiton, but that's
+ * for example due to racy page allocation, but that's
* acceptable because soft-offlined page is not broken
* and if someone really want to use it, they should
* take it.
return ret;
/*
- * Archs like ppc64 need additonal space to store information
+ * Archs like ppc64 need additional space to store information
* related to pte entry. Use the preallocated table for that.
*/
if (arch_needs_pgtable_deposit() && !vmf->prealloc_pte) {
}
/**
- * mm_account_fault - Do page fault accountings
+ * mm_account_fault - Do page fault accounting
*
* @regs: the pt_regs struct pointer. When set to NULL, will skip accounting
* of perf event counters, but we'll still do the per-task accounting to
* @flags: the fault flags.
* @ret: the fault retcode.
*
- * This will take care of most of the page fault accountings. Meanwhile, it
+ * This will take care of most of the page fault accounting. Meanwhile, it
* will also include the PERF_COUNT_SW_PAGE_FAULTS_[MAJ|MIN] perf counter
- * updates. However note that the handling of PERF_COUNT_SW_PAGE_FAULTS should
+ * updates. However, note that the handling of PERF_COUNT_SW_PAGE_FAULTS should
* still be in per-arch page fault handlers at the entry of page fault.
*/
static inline void mm_account_fault(struct pt_regs *regs,
/**
* generic_access_phys - generic implementation for iomem mmap access
* @vma: the vma to access
- * @addr: userspace addres, not relative offset within @vma
+ * @addr: userspace address, not relative offset within @vma
* @buf: buffer to read/write
* @len: length of transfer
* @write: set to FOLL_WRITE when writing, otherwise reading
* we apply policy when gfp_zone(gfp) = ZONE_MOVABLE only.
*
* policy->v.nodes is intersect with node_states[N_MEMORY].
- * so if the following test faile, it implies
+ * so if the following test fails, it implies
* policy->v.nodes has movable memory only.
*/
if (!nodes_intersects(policy->v.nodes, node_states[N_HIGH_MEMORY]))
*
* If tsk's mempolicy is "default" [NULL], return 'true' to indicate default
* policy. Otherwise, check for intersection between mask and the policy
- * nodemask for 'bind' or 'interleave' policy. For 'perferred' or 'local'
+ * nodemask for 'bind' or 'interleave' policy. For 'preferred' or 'local'
* policy, always return true since it may allocate elsewhere on fallback.
*
* Takes task_lock(tsk) to prevent freeing of its mempolicy.
*
* For empty entries inside CPU page table (pte_none() or pmd_none() is true) we
* do set MIGRATE_PFN_MIGRATE flag inside the corresponding source array thus
- * allowing the caller to allocate device memory for those unback virtual
- * address. For this the caller simply has to allocate device memory and
+ * allowing the caller to allocate device memory for those unbacked virtual
+ * addresses. For this the caller simply has to allocate device memory and
* properly set the destination entry like for regular migration. Note that
- * this can still fails and thus inside the device driver must check if the
- * migration was successful for those entries after calling migrate_vma_pages()
+ * this can still fail, and thus inside the device driver you must check if the
+ * migration was successful for those entries after calling migrate_vma_pages(),
* just like for regular migration.
*
* After that, the callers must call migrate_vma_pages() to go over each entry
unsigned long nr_pages = 0;
struct vm_area_struct *vma;
- /* Find first overlaping mapping */
+ /* Find first overlapping mapping */
vma = find_vma_intersection(mm, addr, end);
if (!vma)
return 0;
if (unlikely(uf)) {
/*
* If userfaultfd_unmap_prep returns an error the vmas
- * will remain splitted, but userland will get a
+ * will remain split, but userland will get a
* highly unexpected error anyway. This is no
* different than the case where the first of the two
* __split_vma fails, but we don't undo the first
mmap_write_unlock(current->mm);
/*
- * We could provie warnings or errors if any VMA still
+ * We could provide warnings or errors if any VMA still
* has the pkey set here.
*/
return ret;
* So, to avoid such scenario we can pre-compute if the whole
* operation has high chances to success map-wise.
* Worst-scenario case is when both vma's (new_addr and old_addr) get
- * split in 3 before unmaping it.
+ * split in 3 before unmapping it.
* That means 2 more maps (1 for each) to the ones we already hold.
* Check whether current map count plus 2 still leads us to 4 maps below
* the threshold, otherwise return -ENOMEM here to be more safe.
#ifdef CONFIG_NUMA
/**
- * oom_cpuset_eligible() - check task eligiblity for kill
+ * oom_cpuset_eligible() - check task eligibility for kill
* @start: task struct of which task to consider
* @oc: pointer to struct oom_control
*
break;
/*
- * In the case of an unresponding NFS server and the NFS dirty
+ * In the case of an unresponsive NFS server and the NFS dirty
* pages exceeds dirty_thresh, give the other good wb's a pipe
* to go through, so that tasks on them still remain responsive.
*
* 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
+ * real expectation of this data integrity operation
* even if there is now a new, dirty page at the same
* pagecache address.
*/
return false;
/*
- * Do not let lower order allocations polluate a movable pageblock.
+ * Do not let lower order allocations pollute a movable pageblock.
* This might let an unmovable request use a reclaimable pageblock
* and vice-versa but no more than normal fallback logic which can
* have trouble finding a high-order free page.
/*
* In page freeing path, migratetype change is racy so
* we can counter several free pages in a pageblock
- * in this loop althoug we changed the pageblock type
+ * in this loop although we changed the pageblock type
* from highatomic to ac->migratetype. So we should
* adjust the count once.
*/
* drain_all_pages doesn't use proper cpu hotplug protection so
* we can race with cpu offline when the WQ can move this from
* a cpu pinned worker to an unbound one. We can operate on a different
- * cpu which is allright but we also have to make sure to not move to
+ * cpu which is alright but we also have to make sure to not move to
* a different one.
*/
preempt_disable();
static int __parse_numa_zonelist_order(char *s)
{
/*
- * We used to support different zonlists modes but they turned
+ * We used to support different zonelists modes but they turned
* out to be just not useful. Let's keep the warning in place
* if somebody still use the cmd line parameter so that we do
* not fail it silently
}
/*
- * Some architecturs, e.g. ARC may have ZONE_HIGHMEM below ZONE_NORMAL. For
+ * Some architectures, e.g. ARC may have ZONE_HIGHMEM below ZONE_NORMAL. For
* such cases we allow max_zone_pfn sorted in the descending order
*/
bool __weak arch_has_descending_max_zone_pfns(void)
* alloc_contig_range() -- tries to allocate given range of pages
* @start: start PFN to allocate
* @end: one-past-the-last PFN to allocate
- * @migratetype: migratetype of the underlaying pageblocks (either
+ * @migratetype: migratetype of the underlying pageblocks (either
* #MIGRATE_MOVABLE or #MIGRATE_CMA). All pageblocks
* in range must have the same migratetype and it must
* be either of the two.
/*
* The zone indicated has a new number of managed_pages; batch sizes and percpu
- * page high values need to be recalulated.
+ * page high values need to be recalculated.
*/
void __meminit zone_pcp_update(struct zone *zone)
{
/*
* We don't clear the bit on the oldpage as it's going to be freed
* after migration. Until then, the info can be useful in case of
- * a bug, and the overal stats will be off a bit only temporarily.
+ * a bug, and the overall stats will be off a bit only temporarily.
* Also, migrate_misplaced_transhuge_page() can still fail the
* migration and then we want the oldpage to retain the info. But
* in that case we also don't need to explicitly clear the info from
u64 nr_max_alloc; /* max # of live allocations */
u32 nr_chunks; /* current # of live chunks */
u32 nr_max_chunks; /* max # of live chunks */
- size_t min_alloc_size; /* min allocaiton size */
+ size_t min_alloc_size; /* min allocation size */
size_t max_alloc_size; /* max allocation size */
};
pr_info("limit reached, disable warning\n");
}
if (is_atomic) {
- /* see the flag handling in pcpu_blance_workfn() */
+ /* see the flag handling in pcpu_balance_workfn() */
pcpu_atomic_alloc_failed = true;
pcpu_schedule_balance_work();
} else {
/* SPDX-License-Identifier: GPL-2.0 */
-#ifndef _LINUX_PGALLLC_TRACK_H
-#define _LINUX_PGALLLC_TRACK_H
+#ifndef _LINUX_PGALLOC_TRACK_H
+#define _LINUX_PGALLOC_TRACK_H
#if defined(CONFIG_MMU)
static inline p4d_t *p4d_alloc_track(struct mm_struct *mm, pgd_t *pgd,
(__pte_alloc_kernel(pmd) || ({*(mask)|=PGTBL_PMD_MODIFIED;0;})))?\
NULL: pte_offset_kernel(pmd, address))
-#endif /* _LINUX_PGALLLC_TRACK_H */
+#endif /* _LINUX_PGALLOC_TRACK_H */
#define BATCHREFILL_LIMIT 16
/*
- * Optimization question: fewer reaps means less probability for unnessary
+ * Optimization question: fewer reaps means less probability for unnecessary
* cpucache drain/refill cycles.
*
* OTOH the cpuarrays can contain lots of objects,
};
/*
- * Initialize the state based on the randomization methode available.
- * return true if the pre-computed list is available, false otherwize.
+ * Initialize the state based on the randomization method available.
+ * return true if the pre-computed list is available, false otherwise.
*/
static bool freelist_state_initialize(union freelist_init_state *state,
struct kmem_cache *cachep,
*/
/*
- * Mininum / Maximum order of slab pages. This influences locking overhead
+ * Minimum / Maximum order of slab pages. This influences locking overhead
* and slab fragmentation. A higher order reduces the number of partial slabs
* and increases the number of allocations possible without having to
* take the list_lock.
* to local caches without needing to acquire swap_info
* lock. We do not reuse the returned slots directly but
* move them back to the global pool in a batch. This
- * allows the slots to coaellesce and reduce fragmentation.
+ * allows the slots to coalesce and reduce fragmentation.
*
* The swap entry allocated is marked with SWAP_HAS_CACHE
* flag in map_count that prevents it from being allocated
static atomic_long_t vmap_lazy_nr = ATOMIC_LONG_INIT(0);
/*
- * Serialize vmap purging. There is no actual criticial section protected
+ * Serialize vmap purging. There is no actual critical section protected
* by this look, but we want to avoid concurrent calls for performance
* reasons and to make the pcpu_get_vm_areas more deterministic.
*/
* May sleep if called *not* from interrupt context.
* Must not be called in NMI context (strictly speaking, it could be
* if we have CONFIG_ARCH_HAVE_NMI_SAFE_CMPXCHG, but making the calling
- * conventions for vfree() arch-depenedent would be a really bad idea).
+ * conventions for vfree() arch-dependent would be a really bad idea).
*/
void vfree(const void *addr)
{
/*
* To do safe access to this _mapped_ area, we need
* lock. But adding lock here means that we need to add
- * overhead of vmalloc()/vfree() calles for this _debug_
+ * overhead of vmalloc()/vfree() calls for this _debug_
* interface, rarely used. Instead of that, we'll use
* kmap() and get small overhead in this access function.
*/
/*
* this is only called if !populated_zone(zone), which implies no other users of
- * pset->vm_stat_diff[] exsist.
+ * pset->vm_stat_diff[] exist.
*/
void drain_zonestat(struct zone *zone, struct per_cpu_pageset *pset)
{
* This may hold locks, disable interrupts, and/or preemption,
* and the zpool_unmap_handle() must be called to undo those
* actions. The code that uses the mapped handle should complete
- * its operatons on the mapped handle memory quickly and unmap
+ * its operations on the mapped handle memory quickly and unmap
* as soon as possible. As the implementation may use per-cpu
* data, multiple handles should not be mapped concurrently on
* any cpu.
* zs_map_object - get address of allocated object from handle.
* @pool: pool from which the object was allocated
* @handle: handle returned from zs_malloc
- * @mm: maping mode to use
+ * @mm: mapping mode to use
*
* Before using an object allocated from zs_malloc, it must be mapped using
* this function. When done with the object, it must be unmapped using
projects / kernel.git / commitdiff