2019-05-29 23:57:42 +00:00
|
|
|
// SPDX-License-Identifier: GPL-2.0-only
|
2016-09-17 14:38:44 +00:00
|
|
|
/*
|
|
|
|
* Copyright (C) 2016 Facebook
|
|
|
|
* Copyright (C) 2013-2014 Jens Axboe
|
|
|
|
*/
|
|
|
|
|
2017-02-03 08:57:00 +00:00
|
|
|
#include <linux/sched.h>
|
2016-09-17 08:28:25 +00:00
|
|
|
#include <linux/random.h>
|
2016-09-17 14:38:44 +00:00
|
|
|
#include <linux/sbitmap.h>
|
2017-01-25 22:32:13 +00:00
|
|
|
#include <linux/seq_file.h>
|
2016-09-17 14:38:44 +00:00
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
static int init_alloc_hint(struct sbitmap *sb, gfp_t flags)
|
2021-01-22 02:33:07 +00:00
|
|
|
{
|
2021-01-22 02:33:08 +00:00
|
|
|
unsigned depth = sb->depth;
|
2021-01-22 02:33:07 +00:00
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
sb->alloc_hint = alloc_percpu_gfp(unsigned int, flags);
|
|
|
|
if (!sb->alloc_hint)
|
2021-01-22 02:33:07 +00:00
|
|
|
return -ENOMEM;
|
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
if (depth && !sb->round_robin) {
|
2021-01-22 02:33:07 +00:00
|
|
|
int i;
|
|
|
|
|
|
|
|
for_each_possible_cpu(i)
|
2022-10-10 02:44:02 +00:00
|
|
|
*per_cpu_ptr(sb->alloc_hint, i) = get_random_u32_below(depth);
|
2021-01-22 02:33:07 +00:00
|
|
|
}
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
static inline unsigned update_alloc_hint_before_get(struct sbitmap *sb,
|
2021-01-22 02:33:07 +00:00
|
|
|
unsigned int depth)
|
|
|
|
{
|
|
|
|
unsigned hint;
|
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
hint = this_cpu_read(*sb->alloc_hint);
|
2021-01-22 02:33:07 +00:00
|
|
|
if (unlikely(hint >= depth)) {
|
2022-10-10 02:44:02 +00:00
|
|
|
hint = depth ? get_random_u32_below(depth) : 0;
|
2021-01-22 02:33:08 +00:00
|
|
|
this_cpu_write(*sb->alloc_hint, hint);
|
2021-01-22 02:33:07 +00:00
|
|
|
}
|
|
|
|
|
|
|
|
return hint;
|
|
|
|
}
|
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
static inline void update_alloc_hint_after_get(struct sbitmap *sb,
|
2021-01-22 02:33:07 +00:00
|
|
|
unsigned int depth,
|
|
|
|
unsigned int hint,
|
|
|
|
unsigned int nr)
|
|
|
|
{
|
|
|
|
if (nr == -1) {
|
|
|
|
/* If the map is full, a hint won't do us much good. */
|
2021-01-22 02:33:08 +00:00
|
|
|
this_cpu_write(*sb->alloc_hint, 0);
|
|
|
|
} else if (nr == hint || unlikely(sb->round_robin)) {
|
2021-01-22 02:33:07 +00:00
|
|
|
/* Only update the hint if we used it. */
|
|
|
|
hint = nr + 1;
|
|
|
|
if (hint >= depth - 1)
|
|
|
|
hint = 0;
|
2021-01-22 02:33:08 +00:00
|
|
|
this_cpu_write(*sb->alloc_hint, hint);
|
2021-01-22 02:33:07 +00:00
|
|
|
}
|
|
|
|
}
|
|
|
|
|
2018-12-12 01:39:41 +00:00
|
|
|
/*
|
|
|
|
* See if we have deferred clears that we can batch move
|
|
|
|
*/
|
2020-11-22 15:35:45 +00:00
|
|
|
static inline bool sbitmap_deferred_clear(struct sbitmap_word *map)
|
2018-12-12 01:39:41 +00:00
|
|
|
{
|
2020-11-22 15:35:47 +00:00
|
|
|
unsigned long mask;
|
2018-12-12 01:39:41 +00:00
|
|
|
|
2020-11-22 15:35:46 +00:00
|
|
|
if (!READ_ONCE(map->cleared))
|
|
|
|
return false;
|
2018-12-12 01:39:41 +00:00
|
|
|
|
|
|
|
/*
|
|
|
|
* First get a stable cleared mask, setting the old mask to 0.
|
|
|
|
*/
|
2020-11-22 15:35:45 +00:00
|
|
|
mask = xchg(&map->cleared, 0);
|
2018-12-12 01:39:41 +00:00
|
|
|
|
|
|
|
/*
|
|
|
|
* Now clear the masked bits in our free word
|
|
|
|
*/
|
2020-11-22 15:35:47 +00:00
|
|
|
atomic_long_andnot(mask, (atomic_long_t *)&map->word);
|
|
|
|
BUILD_BUG_ON(sizeof(atomic_long_t) != sizeof(map->word));
|
2020-11-22 15:35:46 +00:00
|
|
|
return true;
|
2018-12-12 01:39:41 +00:00
|
|
|
}
|
|
|
|
|
2016-09-17 14:38:44 +00:00
|
|
|
int sbitmap_init_node(struct sbitmap *sb, unsigned int depth, int shift,
|
2021-01-22 02:33:08 +00:00
|
|
|
gfp_t flags, int node, bool round_robin,
|
|
|
|
bool alloc_hint)
|
2016-09-17 14:38:44 +00:00
|
|
|
{
|
|
|
|
unsigned int bits_per_word;
|
|
|
|
|
2021-01-22 02:33:10 +00:00
|
|
|
if (shift < 0)
|
|
|
|
shift = sbitmap_calculate_shift(depth);
|
|
|
|
|
2016-09-17 14:38:44 +00:00
|
|
|
bits_per_word = 1U << shift;
|
|
|
|
if (bits_per_word > BITS_PER_LONG)
|
|
|
|
return -EINVAL;
|
|
|
|
|
|
|
|
sb->shift = shift;
|
|
|
|
sb->depth = depth;
|
|
|
|
sb->map_nr = DIV_ROUND_UP(sb->depth, bits_per_word);
|
2021-01-22 02:33:06 +00:00
|
|
|
sb->round_robin = round_robin;
|
2016-09-17 14:38:44 +00:00
|
|
|
|
|
|
|
if (depth == 0) {
|
|
|
|
sb->map = NULL;
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
if (alloc_hint) {
|
|
|
|
if (init_alloc_hint(sb, flags))
|
|
|
|
return -ENOMEM;
|
|
|
|
} else {
|
|
|
|
sb->alloc_hint = NULL;
|
|
|
|
}
|
|
|
|
|
2022-03-16 01:27:08 +00:00
|
|
|
sb->map = kvzalloc_node(sb->map_nr * sizeof(*sb->map), flags, node);
|
2021-01-22 02:33:08 +00:00
|
|
|
if (!sb->map) {
|
|
|
|
free_percpu(sb->alloc_hint);
|
2016-09-17 14:38:44 +00:00
|
|
|
return -ENOMEM;
|
2021-01-22 02:33:08 +00:00
|
|
|
}
|
2016-09-17 14:38:44 +00:00
|
|
|
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_init_node);
|
|
|
|
|
|
|
|
void sbitmap_resize(struct sbitmap *sb, unsigned int depth)
|
|
|
|
{
|
|
|
|
unsigned int bits_per_word = 1U << sb->shift;
|
|
|
|
unsigned int i;
|
|
|
|
|
2018-12-12 01:39:41 +00:00
|
|
|
for (i = 0; i < sb->map_nr; i++)
|
2020-11-22 15:35:45 +00:00
|
|
|
sbitmap_deferred_clear(&sb->map[i]);
|
2018-12-12 01:39:41 +00:00
|
|
|
|
2016-09-17 14:38:44 +00:00
|
|
|
sb->depth = depth;
|
|
|
|
sb->map_nr = DIV_ROUND_UP(sb->depth, bits_per_word);
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_resize);
|
|
|
|
|
2017-04-14 07:59:58 +00:00
|
|
|
static int __sbitmap_get_word(unsigned long *word, unsigned long depth,
|
|
|
|
unsigned int hint, bool wrap)
|
2016-09-17 14:38:44 +00:00
|
|
|
{
|
|
|
|
int nr;
|
|
|
|
|
2020-11-22 15:35:48 +00:00
|
|
|
/* don't wrap if starting from 0 */
|
|
|
|
wrap = wrap && hint;
|
|
|
|
|
2016-09-17 14:38:44 +00:00
|
|
|
while (1) {
|
2017-04-14 07:59:58 +00:00
|
|
|
nr = find_next_zero_bit(word, depth, hint);
|
|
|
|
if (unlikely(nr >= depth)) {
|
2016-09-17 14:38:44 +00:00
|
|
|
/*
|
|
|
|
* We started with an offset, and we didn't reset the
|
|
|
|
* offset to 0 in a failure case, so start from 0 to
|
|
|
|
* exhaust the map.
|
|
|
|
*/
|
2020-11-22 15:35:48 +00:00
|
|
|
if (hint && wrap) {
|
|
|
|
hint = 0;
|
2016-09-17 14:38:44 +00:00
|
|
|
continue;
|
|
|
|
}
|
|
|
|
return -1;
|
|
|
|
}
|
|
|
|
|
2018-02-28 00:56:43 +00:00
|
|
|
if (!test_and_set_bit_lock(nr, word))
|
2016-09-17 14:38:44 +00:00
|
|
|
break;
|
|
|
|
|
|
|
|
hint = nr + 1;
|
2017-04-14 07:59:58 +00:00
|
|
|
if (hint >= depth - 1)
|
2016-09-17 14:38:44 +00:00
|
|
|
hint = 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
return nr;
|
|
|
|
}
|
|
|
|
|
2018-11-30 20:18:06 +00:00
|
|
|
static int sbitmap_find_bit_in_index(struct sbitmap *sb, int index,
|
2021-01-22 02:33:06 +00:00
|
|
|
unsigned int alloc_hint)
|
2018-11-30 20:18:06 +00:00
|
|
|
{
|
2020-11-22 15:35:45 +00:00
|
|
|
struct sbitmap_word *map = &sb->map[index];
|
2018-11-30 20:18:06 +00:00
|
|
|
int nr;
|
|
|
|
|
|
|
|
do {
|
2022-01-10 07:29:45 +00:00
|
|
|
nr = __sbitmap_get_word(&map->word, __map_depth(sb, index),
|
|
|
|
alloc_hint, !sb->round_robin);
|
2018-11-30 20:18:06 +00:00
|
|
|
if (nr != -1)
|
|
|
|
break;
|
2020-11-22 15:35:45 +00:00
|
|
|
if (!sbitmap_deferred_clear(map))
|
2018-11-30 20:18:06 +00:00
|
|
|
break;
|
|
|
|
} while (1);
|
|
|
|
|
|
|
|
return nr;
|
|
|
|
}
|
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
static int __sbitmap_get(struct sbitmap *sb, unsigned int alloc_hint)
|
2016-09-17 14:38:44 +00:00
|
|
|
{
|
|
|
|
unsigned int i, index;
|
|
|
|
int nr = -1;
|
|
|
|
|
|
|
|
index = SB_NR_TO_INDEX(sb, alloc_hint);
|
|
|
|
|
2018-11-29 19:35:16 +00:00
|
|
|
/*
|
|
|
|
* Unless we're doing round robin tag allocation, just use the
|
|
|
|
* alloc_hint to find the right word index. No point in looping
|
|
|
|
* twice in find_next_zero_bit() for that case.
|
|
|
|
*/
|
2021-01-22 02:33:06 +00:00
|
|
|
if (sb->round_robin)
|
2018-11-29 19:35:16 +00:00
|
|
|
alloc_hint = SB_NR_TO_BIT(sb, alloc_hint);
|
|
|
|
else
|
|
|
|
alloc_hint = 0;
|
|
|
|
|
2016-09-17 14:38:44 +00:00
|
|
|
for (i = 0; i < sb->map_nr; i++) {
|
2021-01-22 02:33:06 +00:00
|
|
|
nr = sbitmap_find_bit_in_index(sb, index, alloc_hint);
|
2016-09-17 14:38:44 +00:00
|
|
|
if (nr != -1) {
|
|
|
|
nr += index << sb->shift;
|
|
|
|
break;
|
|
|
|
}
|
|
|
|
|
|
|
|
/* Jump to next index. */
|
2018-11-29 19:35:16 +00:00
|
|
|
alloc_hint = 0;
|
|
|
|
if (++index >= sb->map_nr)
|
2016-09-17 14:38:44 +00:00
|
|
|
index = 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
return nr;
|
|
|
|
}
|
2021-01-22 02:33:08 +00:00
|
|
|
|
|
|
|
int sbitmap_get(struct sbitmap *sb)
|
|
|
|
{
|
|
|
|
int nr;
|
|
|
|
unsigned int hint, depth;
|
|
|
|
|
|
|
|
if (WARN_ON_ONCE(unlikely(!sb->alloc_hint)))
|
|
|
|
return -1;
|
|
|
|
|
|
|
|
depth = READ_ONCE(sb->depth);
|
|
|
|
hint = update_alloc_hint_before_get(sb, depth);
|
|
|
|
nr = __sbitmap_get(sb, hint);
|
|
|
|
update_alloc_hint_after_get(sb, depth, hint, nr);
|
|
|
|
|
|
|
|
return nr;
|
|
|
|
}
|
2016-09-17 14:38:44 +00:00
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_get);
|
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
static int __sbitmap_get_shallow(struct sbitmap *sb,
|
|
|
|
unsigned int alloc_hint,
|
|
|
|
unsigned long shallow_depth)
|
2017-04-14 07:59:58 +00:00
|
|
|
{
|
|
|
|
unsigned int i, index;
|
|
|
|
int nr = -1;
|
|
|
|
|
|
|
|
index = SB_NR_TO_INDEX(sb, alloc_hint);
|
|
|
|
|
|
|
|
for (i = 0; i < sb->map_nr; i++) {
|
2018-12-12 01:39:41 +00:00
|
|
|
again:
|
2017-04-14 07:59:58 +00:00
|
|
|
nr = __sbitmap_get_word(&sb->map[index].word,
|
2022-01-10 07:29:45 +00:00
|
|
|
min_t(unsigned int,
|
|
|
|
__map_depth(sb, index),
|
|
|
|
shallow_depth),
|
2017-04-14 07:59:58 +00:00
|
|
|
SB_NR_TO_BIT(sb, alloc_hint), true);
|
|
|
|
if (nr != -1) {
|
|
|
|
nr += index << sb->shift;
|
|
|
|
break;
|
|
|
|
}
|
|
|
|
|
2020-11-22 15:35:45 +00:00
|
|
|
if (sbitmap_deferred_clear(&sb->map[index]))
|
2018-12-12 01:39:41 +00:00
|
|
|
goto again;
|
|
|
|
|
2017-04-14 07:59:58 +00:00
|
|
|
/* Jump to next index. */
|
|
|
|
index++;
|
|
|
|
alloc_hint = index << sb->shift;
|
|
|
|
|
|
|
|
if (index >= sb->map_nr) {
|
|
|
|
index = 0;
|
|
|
|
alloc_hint = 0;
|
|
|
|
}
|
|
|
|
}
|
|
|
|
|
|
|
|
return nr;
|
|
|
|
}
|
2021-01-22 02:33:08 +00:00
|
|
|
|
|
|
|
int sbitmap_get_shallow(struct sbitmap *sb, unsigned long shallow_depth)
|
|
|
|
{
|
|
|
|
int nr;
|
|
|
|
unsigned int hint, depth;
|
|
|
|
|
|
|
|
if (WARN_ON_ONCE(unlikely(!sb->alloc_hint)))
|
|
|
|
return -1;
|
|
|
|
|
|
|
|
depth = READ_ONCE(sb->depth);
|
|
|
|
hint = update_alloc_hint_before_get(sb, depth);
|
|
|
|
nr = __sbitmap_get_shallow(sb, hint, shallow_depth);
|
|
|
|
update_alloc_hint_after_get(sb, depth, hint, nr);
|
|
|
|
|
|
|
|
return nr;
|
|
|
|
}
|
2017-04-14 07:59:58 +00:00
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_get_shallow);
|
|
|
|
|
2016-09-17 14:38:44 +00:00
|
|
|
bool sbitmap_any_bit_set(const struct sbitmap *sb)
|
|
|
|
{
|
|
|
|
unsigned int i;
|
|
|
|
|
|
|
|
for (i = 0; i < sb->map_nr; i++) {
|
2018-12-12 01:39:41 +00:00
|
|
|
if (sb->map[i].word & ~sb->map[i].cleared)
|
2016-09-17 14:38:44 +00:00
|
|
|
return true;
|
|
|
|
}
|
|
|
|
return false;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_any_bit_set);
|
|
|
|
|
2018-11-30 20:18:06 +00:00
|
|
|
static unsigned int __sbitmap_weight(const struct sbitmap *sb, bool set)
|
2016-09-17 14:38:44 +00:00
|
|
|
{
|
2016-09-19 13:34:08 +00:00
|
|
|
unsigned int i, weight = 0;
|
2016-09-17 14:38:44 +00:00
|
|
|
|
|
|
|
for (i = 0; i < sb->map_nr; i++) {
|
|
|
|
const struct sbitmap_word *word = &sb->map[i];
|
2022-01-10 07:29:45 +00:00
|
|
|
unsigned int word_depth = __map_depth(sb, i);
|
2016-09-17 14:38:44 +00:00
|
|
|
|
2018-11-30 20:18:06 +00:00
|
|
|
if (set)
|
2022-01-10 07:29:45 +00:00
|
|
|
weight += bitmap_weight(&word->word, word_depth);
|
2018-11-30 20:18:06 +00:00
|
|
|
else
|
2022-01-10 07:29:45 +00:00
|
|
|
weight += bitmap_weight(&word->cleared, word_depth);
|
2016-09-17 14:38:44 +00:00
|
|
|
}
|
|
|
|
return weight;
|
|
|
|
}
|
2018-11-30 20:18:06 +00:00
|
|
|
|
2021-01-22 02:33:09 +00:00
|
|
|
static unsigned int sbitmap_cleared(const struct sbitmap *sb)
|
2018-11-30 20:18:06 +00:00
|
|
|
{
|
2021-01-22 02:33:09 +00:00
|
|
|
return __sbitmap_weight(sb, false);
|
2018-11-30 20:18:06 +00:00
|
|
|
}
|
|
|
|
|
2021-01-22 02:33:09 +00:00
|
|
|
unsigned int sbitmap_weight(const struct sbitmap *sb)
|
2018-11-30 20:18:06 +00:00
|
|
|
{
|
2021-01-22 02:33:09 +00:00
|
|
|
return __sbitmap_weight(sb, true) - sbitmap_cleared(sb);
|
2018-11-30 20:18:06 +00:00
|
|
|
}
|
2021-01-22 02:33:09 +00:00
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_weight);
|
2016-09-17 14:38:44 +00:00
|
|
|
|
2017-01-25 22:32:13 +00:00
|
|
|
void sbitmap_show(struct sbitmap *sb, struct seq_file *m)
|
|
|
|
{
|
|
|
|
seq_printf(m, "depth=%u\n", sb->depth);
|
2021-01-22 02:33:09 +00:00
|
|
|
seq_printf(m, "busy=%u\n", sbitmap_weight(sb));
|
2018-11-30 20:18:06 +00:00
|
|
|
seq_printf(m, "cleared=%u\n", sbitmap_cleared(sb));
|
2017-01-25 22:32:13 +00:00
|
|
|
seq_printf(m, "bits_per_word=%u\n", 1U << sb->shift);
|
|
|
|
seq_printf(m, "map_nr=%u\n", sb->map_nr);
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_show);
|
|
|
|
|
|
|
|
static inline void emit_byte(struct seq_file *m, unsigned int offset, u8 byte)
|
|
|
|
{
|
|
|
|
if ((offset & 0xf) == 0) {
|
|
|
|
if (offset != 0)
|
|
|
|
seq_putc(m, '\n');
|
|
|
|
seq_printf(m, "%08x:", offset);
|
|
|
|
}
|
|
|
|
if ((offset & 0x1) == 0)
|
|
|
|
seq_putc(m, ' ');
|
|
|
|
seq_printf(m, "%02x", byte);
|
|
|
|
}
|
|
|
|
|
|
|
|
void sbitmap_bitmap_show(struct sbitmap *sb, struct seq_file *m)
|
|
|
|
{
|
|
|
|
u8 byte = 0;
|
|
|
|
unsigned int byte_bits = 0;
|
|
|
|
unsigned int offset = 0;
|
|
|
|
int i;
|
|
|
|
|
|
|
|
for (i = 0; i < sb->map_nr; i++) {
|
|
|
|
unsigned long word = READ_ONCE(sb->map[i].word);
|
2020-07-01 08:06:25 +00:00
|
|
|
unsigned long cleared = READ_ONCE(sb->map[i].cleared);
|
2022-01-10 07:29:45 +00:00
|
|
|
unsigned int word_bits = __map_depth(sb, i);
|
2017-01-25 22:32:13 +00:00
|
|
|
|
2020-07-01 08:06:25 +00:00
|
|
|
word &= ~cleared;
|
|
|
|
|
2017-01-25 22:32:13 +00:00
|
|
|
while (word_bits > 0) {
|
|
|
|
unsigned int bits = min(8 - byte_bits, word_bits);
|
|
|
|
|
|
|
|
byte |= (word & (BIT(bits) - 1)) << byte_bits;
|
|
|
|
byte_bits += bits;
|
|
|
|
if (byte_bits == 8) {
|
|
|
|
emit_byte(m, offset, byte);
|
|
|
|
byte = 0;
|
|
|
|
byte_bits = 0;
|
|
|
|
offset++;
|
|
|
|
}
|
|
|
|
word >>= bits;
|
|
|
|
word_bits -= bits;
|
|
|
|
}
|
|
|
|
}
|
|
|
|
if (byte_bits) {
|
|
|
|
emit_byte(m, offset, byte);
|
|
|
|
offset++;
|
|
|
|
}
|
|
|
|
if (offset)
|
|
|
|
seq_putc(m, '\n');
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_bitmap_show);
|
|
|
|
|
2018-05-10 00:16:31 +00:00
|
|
|
static unsigned int sbq_calc_wake_batch(struct sbitmap_queue *sbq,
|
|
|
|
unsigned int depth)
|
2016-09-17 14:38:44 +00:00
|
|
|
{
|
|
|
|
unsigned int wake_batch;
|
2018-05-10 00:16:31 +00:00
|
|
|
unsigned int shallow_depth;
|
2016-09-17 14:38:44 +00:00
|
|
|
|
|
|
|
/*
|
|
|
|
* For each batch, we wake up one queue. We need to make sure that our
|
2018-05-10 00:16:31 +00:00
|
|
|
* batch size is small enough that the full depth of the bitmap,
|
|
|
|
* potentially limited by a shallow depth, is enough to wake up all of
|
|
|
|
* the queues.
|
|
|
|
*
|
|
|
|
* Each full word of the bitmap has bits_per_word bits, and there might
|
|
|
|
* be a partial word. There are depth / bits_per_word full words and
|
|
|
|
* depth % bits_per_word bits left over. In bitwise arithmetic:
|
|
|
|
*
|
|
|
|
* bits_per_word = 1 << shift
|
|
|
|
* depth / bits_per_word = depth >> shift
|
|
|
|
* depth % bits_per_word = depth & ((1 << shift) - 1)
|
|
|
|
*
|
|
|
|
* Each word can be limited to sbq->min_shallow_depth bits.
|
2016-09-17 14:38:44 +00:00
|
|
|
*/
|
2018-05-10 00:16:31 +00:00
|
|
|
shallow_depth = min(1U << sbq->sb.shift, sbq->min_shallow_depth);
|
|
|
|
depth = ((depth >> sbq->sb.shift) * shallow_depth +
|
|
|
|
min(depth & ((1U << sbq->sb.shift) - 1), shallow_depth));
|
|
|
|
wake_batch = clamp_t(unsigned int, depth / SBQ_WAIT_QUEUES, 1,
|
|
|
|
SBQ_WAKE_BATCH);
|
2016-09-17 14:38:44 +00:00
|
|
|
|
|
|
|
return wake_batch;
|
|
|
|
}
|
|
|
|
|
|
|
|
int sbitmap_queue_init_node(struct sbitmap_queue *sbq, unsigned int depth,
|
2016-09-17 08:28:24 +00:00
|
|
|
int shift, bool round_robin, gfp_t flags, int node)
|
2016-09-17 14:38:44 +00:00
|
|
|
{
|
|
|
|
int ret;
|
|
|
|
int i;
|
|
|
|
|
2021-01-22 02:33:06 +00:00
|
|
|
ret = sbitmap_init_node(&sbq->sb, depth, shift, flags, node,
|
2021-01-22 02:33:08 +00:00
|
|
|
round_robin, true);
|
2016-09-17 14:38:44 +00:00
|
|
|
if (ret)
|
|
|
|
return ret;
|
|
|
|
|
2018-05-10 00:16:31 +00:00
|
|
|
sbq->min_shallow_depth = UINT_MAX;
|
|
|
|
sbq->wake_batch = sbq_calc_wake_batch(sbq, depth);
|
2016-09-17 14:38:44 +00:00
|
|
|
atomic_set(&sbq->wake_index, 0);
|
2018-11-30 00:36:41 +00:00
|
|
|
atomic_set(&sbq->ws_active, 0);
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
atomic_set(&sbq->completion_cnt, 0);
|
|
|
|
atomic_set(&sbq->wakeup_cnt, 0);
|
2016-09-17 14:38:44 +00:00
|
|
|
|
2016-09-17 08:28:22 +00:00
|
|
|
sbq->ws = kzalloc_node(SBQ_WAIT_QUEUES * sizeof(*sbq->ws), flags, node);
|
2016-09-17 14:38:44 +00:00
|
|
|
if (!sbq->ws) {
|
|
|
|
sbitmap_free(&sbq->sb);
|
|
|
|
return -ENOMEM;
|
|
|
|
}
|
|
|
|
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
for (i = 0; i < SBQ_WAIT_QUEUES; i++)
|
2016-09-17 14:38:44 +00:00
|
|
|
init_waitqueue_head(&sbq->ws[i].wait);
|
2016-09-17 08:28:24 +00:00
|
|
|
|
2016-09-17 14:38:44 +00:00
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_queue_init_node);
|
|
|
|
|
2022-01-13 02:55:36 +00:00
|
|
|
static void sbitmap_queue_update_wake_batch(struct sbitmap_queue *sbq,
|
|
|
|
unsigned int depth)
|
|
|
|
{
|
|
|
|
unsigned int wake_batch;
|
|
|
|
|
|
|
|
wake_batch = sbq_calc_wake_batch(sbq, depth);
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
if (sbq->wake_batch != wake_batch)
|
|
|
|
WRITE_ONCE(sbq->wake_batch, wake_batch);
|
2022-01-13 02:55:36 +00:00
|
|
|
}
|
|
|
|
|
|
|
|
void sbitmap_queue_recalculate_wake_batch(struct sbitmap_queue *sbq,
|
|
|
|
unsigned int users)
|
|
|
|
{
|
|
|
|
unsigned int wake_batch;
|
2022-01-27 10:00:47 +00:00
|
|
|
unsigned int min_batch;
|
|
|
|
unsigned int depth = (sbq->sb.depth + users - 1) / users;
|
2022-01-13 02:55:36 +00:00
|
|
|
|
2022-01-27 10:00:47 +00:00
|
|
|
min_batch = sbq->sb.depth >= (4 * SBQ_WAIT_QUEUES) ? 4 : 1;
|
|
|
|
|
|
|
|
wake_batch = clamp_val(depth / SBQ_WAIT_QUEUES,
|
|
|
|
min_batch, SBQ_WAKE_BATCH);
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
|
|
|
|
WRITE_ONCE(sbq->wake_batch, wake_batch);
|
2022-01-13 02:55:36 +00:00
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_queue_recalculate_wake_batch);
|
|
|
|
|
2018-05-10 00:16:31 +00:00
|
|
|
void sbitmap_queue_resize(struct sbitmap_queue *sbq, unsigned int depth)
|
|
|
|
{
|
|
|
|
sbitmap_queue_update_wake_batch(sbq, depth);
|
2016-09-17 14:38:44 +00:00
|
|
|
sbitmap_resize(&sbq->sb, depth);
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_queue_resize);
|
|
|
|
|
2016-09-17 08:28:24 +00:00
|
|
|
int __sbitmap_queue_get(struct sbitmap_queue *sbq)
|
2016-09-17 08:28:23 +00:00
|
|
|
{
|
2021-01-22 02:33:08 +00:00
|
|
|
return sbitmap_get(&sbq->sb);
|
2016-09-17 08:28:23 +00:00
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(__sbitmap_queue_get);
|
|
|
|
|
2021-10-09 19:02:23 +00:00
|
|
|
unsigned long __sbitmap_queue_get_batch(struct sbitmap_queue *sbq, int nr_tags,
|
|
|
|
unsigned int *offset)
|
|
|
|
{
|
|
|
|
struct sbitmap *sb = &sbq->sb;
|
|
|
|
unsigned int hint, depth;
|
|
|
|
unsigned long index, nr;
|
|
|
|
int i;
|
|
|
|
|
|
|
|
if (unlikely(sb->round_robin))
|
|
|
|
return 0;
|
|
|
|
|
|
|
|
depth = READ_ONCE(sb->depth);
|
|
|
|
hint = update_alloc_hint_before_get(sb, depth);
|
|
|
|
|
|
|
|
index = SB_NR_TO_INDEX(sb, hint);
|
|
|
|
|
|
|
|
for (i = 0; i < sb->map_nr; i++) {
|
|
|
|
struct sbitmap_word *map = &sb->map[index];
|
|
|
|
unsigned long get_mask;
|
2022-01-10 07:29:45 +00:00
|
|
|
unsigned int map_depth = __map_depth(sb, index);
|
2021-10-09 19:02:23 +00:00
|
|
|
|
|
|
|
sbitmap_deferred_clear(map);
|
2022-01-10 07:29:45 +00:00
|
|
|
if (map->word == (1UL << (map_depth - 1)) - 1)
|
2022-06-05 14:58:35 +00:00
|
|
|
goto next;
|
2021-10-09 19:02:23 +00:00
|
|
|
|
2022-01-10 07:29:45 +00:00
|
|
|
nr = find_first_zero_bit(&map->word, map_depth);
|
|
|
|
if (nr + nr_tags <= map_depth) {
|
2021-10-09 19:02:23 +00:00
|
|
|
atomic_long_t *ptr = (atomic_long_t *) &map->word;
|
2022-09-08 15:12:00 +00:00
|
|
|
unsigned long val;
|
2021-10-09 19:02:23 +00:00
|
|
|
|
2022-08-26 03:14:13 +00:00
|
|
|
get_mask = ((1UL << nr_tags) - 1) << nr;
|
2022-09-08 15:12:00 +00:00
|
|
|
val = READ_ONCE(map->word);
|
2021-10-09 19:02:23 +00:00
|
|
|
do {
|
2022-06-05 14:58:35 +00:00
|
|
|
if ((val & ~get_mask) != val)
|
|
|
|
goto next;
|
2022-09-08 15:12:00 +00:00
|
|
|
} while (!atomic_long_try_cmpxchg(ptr, &val,
|
|
|
|
get_mask | val));
|
|
|
|
get_mask = (get_mask & ~val) >> nr;
|
2021-10-09 19:02:23 +00:00
|
|
|
if (get_mask) {
|
|
|
|
*offset = nr + (index << sb->shift);
|
|
|
|
update_alloc_hint_after_get(sb, depth, hint,
|
2022-08-26 03:14:13 +00:00
|
|
|
*offset + nr_tags - 1);
|
2021-10-09 19:02:23 +00:00
|
|
|
return get_mask;
|
|
|
|
}
|
|
|
|
}
|
2022-06-05 14:58:35 +00:00
|
|
|
next:
|
2021-10-09 19:02:23 +00:00
|
|
|
/* Jump to next index. */
|
|
|
|
if (++index >= sb->map_nr)
|
|
|
|
index = 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
2022-02-08 12:07:04 +00:00
|
|
|
int sbitmap_queue_get_shallow(struct sbitmap_queue *sbq,
|
|
|
|
unsigned int shallow_depth)
|
2017-04-14 07:59:58 +00:00
|
|
|
{
|
2018-05-10 00:29:24 +00:00
|
|
|
WARN_ON_ONCE(shallow_depth < sbq->min_shallow_depth);
|
|
|
|
|
2021-01-22 02:33:08 +00:00
|
|
|
return sbitmap_get_shallow(&sbq->sb, shallow_depth);
|
2017-04-14 07:59:58 +00:00
|
|
|
}
|
2022-02-08 12:07:04 +00:00
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_queue_get_shallow);
|
2017-04-14 07:59:58 +00:00
|
|
|
|
2018-05-10 00:16:31 +00:00
|
|
|
void sbitmap_queue_min_shallow_depth(struct sbitmap_queue *sbq,
|
|
|
|
unsigned int min_shallow_depth)
|
|
|
|
{
|
|
|
|
sbq->min_shallow_depth = min_shallow_depth;
|
|
|
|
sbitmap_queue_update_wake_batch(sbq, sbq->sb.depth);
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_queue_min_shallow_depth);
|
|
|
|
|
2022-11-15 22:45:53 +00:00
|
|
|
static void __sbitmap_queue_wake_up(struct sbitmap_queue *sbq, int nr)
|
2016-09-17 14:38:44 +00:00
|
|
|
{
|
|
|
|
int i, wake_index;
|
|
|
|
|
2018-11-30 00:36:41 +00:00
|
|
|
if (!atomic_read(&sbq->ws_active))
|
2022-11-15 22:45:53 +00:00
|
|
|
return;
|
2018-11-30 00:36:41 +00:00
|
|
|
|
2016-09-17 14:38:44 +00:00
|
|
|
wake_index = atomic_read(&sbq->wake_index);
|
|
|
|
for (i = 0; i < SBQ_WAIT_QUEUES; i++) {
|
|
|
|
struct sbq_wait_state *ws = &sbq->ws[wake_index];
|
|
|
|
|
2022-11-15 22:45:51 +00:00
|
|
|
/*
|
|
|
|
* Advance the index before checking the current queue.
|
|
|
|
* It improves fairness, by ensuring the queue doesn't
|
|
|
|
* need to be fully emptied before trying to wake up
|
|
|
|
* from the next one.
|
|
|
|
*/
|
2016-09-17 14:38:44 +00:00
|
|
|
wake_index = sbq_index_inc(wake_index);
|
2022-11-15 22:45:51 +00:00
|
|
|
|
2022-11-15 22:45:53 +00:00
|
|
|
/*
|
|
|
|
* It is sufficient to wake up at least one waiter to
|
|
|
|
* guarantee forward progress.
|
|
|
|
*/
|
|
|
|
if (waitqueue_active(&ws->wait) &&
|
|
|
|
wake_up_nr(&ws->wait, nr))
|
|
|
|
break;
|
2016-09-17 14:38:44 +00:00
|
|
|
}
|
|
|
|
|
2022-11-15 22:45:53 +00:00
|
|
|
if (wake_index != atomic_read(&sbq->wake_index))
|
|
|
|
atomic_set(&sbq->wake_index, wake_index);
|
2016-09-17 14:38:44 +00:00
|
|
|
}
|
|
|
|
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
void sbitmap_queue_wake_up(struct sbitmap_queue *sbq, int nr)
|
2016-09-17 14:38:44 +00:00
|
|
|
{
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
unsigned int wake_batch = READ_ONCE(sbq->wake_batch);
|
|
|
|
unsigned int wakeups;
|
2016-09-17 14:38:44 +00:00
|
|
|
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
if (!atomic_read(&sbq->ws_active))
|
|
|
|
return;
|
2022-09-09 18:40:22 +00:00
|
|
|
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
atomic_add(nr, &sbq->completion_cnt);
|
|
|
|
wakeups = atomic_read(&sbq->wakeup_cnt);
|
2016-09-17 14:38:44 +00:00
|
|
|
|
2022-09-09 18:40:22 +00:00
|
|
|
do {
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
if (atomic_read(&sbq->completion_cnt) - wakeups < wake_batch)
|
|
|
|
return;
|
|
|
|
} while (!atomic_try_cmpxchg(&sbq->wakeup_cnt,
|
|
|
|
&wakeups, wakeups + wake_batch));
|
sbitmap: fix race in wait batch accounting
If we have multiple callers of sbq_wake_up(), we can end up in a
situation where the wait_cnt will continually go more and more
negative. Consider the case where our wake batch is 1, hence
wait_cnt will start out as 1.
wait_cnt == 1
CPU0 CPU1
atomic_dec_return(), cnt == 0
atomic_dec_return(), cnt == -1
cmpxchg(-1, 0) (succeeds)
[wait_cnt now 0]
cmpxchg(0, 1) (fails)
This ends up with wait_cnt being 0, we'll wakeup immediately
next time. Going through the same loop as above again, and
we'll have wait_cnt -1.
For the case where we have a larger wake batch, the only
difference is that the starting point will be higher. We'll
still end up with continually smaller batch wakeups, which
defeats the purpose of the rolling wakeups.
Always reset the wait_cnt to the batch value. Then it doesn't
matter who wins the race. But ensure that whomever does win
the race is the one that increments the ws index and wakes up
our batch count, loser gets to call __sbq_wake_up() again to
account his wakeups towards the next active wait state index.
Fixes: 6c0ca7ae292a ("sbitmap: fix wakeup hang after sbq resize")
Reviewed-by: Omar Sandoval <osandov@fb.com>
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2018-05-14 18:17:31 +00:00
|
|
|
|
2022-11-15 22:45:53 +00:00
|
|
|
__sbitmap_queue_wake_up(sbq, wake_batch);
|
2016-09-17 14:38:44 +00:00
|
|
|
}
|
2022-09-04 12:39:25 +00:00
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_queue_wake_up);
|
2016-09-17 14:38:44 +00:00
|
|
|
|
2021-10-08 11:44:23 +00:00
|
|
|
static inline void sbitmap_update_cpu_hint(struct sbitmap *sb, int cpu, int tag)
|
|
|
|
{
|
|
|
|
if (likely(!sb->round_robin && tag < sb->depth))
|
2021-10-25 16:45:01 +00:00
|
|
|
data_race(*per_cpu_ptr(sb->alloc_hint, cpu) = tag);
|
2021-10-08 11:44:23 +00:00
|
|
|
}
|
|
|
|
|
|
|
|
void sbitmap_queue_clear_batch(struct sbitmap_queue *sbq, int offset,
|
|
|
|
int *tags, int nr_tags)
|
|
|
|
{
|
|
|
|
struct sbitmap *sb = &sbq->sb;
|
|
|
|
unsigned long *addr = NULL;
|
|
|
|
unsigned long mask = 0;
|
|
|
|
int i;
|
|
|
|
|
|
|
|
smp_mb__before_atomic();
|
|
|
|
for (i = 0; i < nr_tags; i++) {
|
|
|
|
const int tag = tags[i] - offset;
|
|
|
|
unsigned long *this_addr;
|
|
|
|
|
|
|
|
/* since we're clearing a batch, skip the deferred map */
|
|
|
|
this_addr = &sb->map[SB_NR_TO_INDEX(sb, tag)].word;
|
|
|
|
if (!addr) {
|
|
|
|
addr = this_addr;
|
|
|
|
} else if (addr != this_addr) {
|
|
|
|
atomic_long_andnot(mask, (atomic_long_t *) addr);
|
|
|
|
mask = 0;
|
|
|
|
addr = this_addr;
|
|
|
|
}
|
|
|
|
mask |= (1UL << SB_NR_TO_BIT(sb, tag));
|
|
|
|
}
|
|
|
|
|
|
|
|
if (mask)
|
|
|
|
atomic_long_andnot(mask, (atomic_long_t *) addr);
|
|
|
|
|
|
|
|
smp_mb__after_atomic();
|
2022-09-09 18:40:22 +00:00
|
|
|
sbitmap_queue_wake_up(sbq, nr_tags);
|
2021-10-08 11:44:23 +00:00
|
|
|
sbitmap_update_cpu_hint(&sbq->sb, raw_smp_processor_id(),
|
|
|
|
tags[nr_tags - 1] - offset);
|
|
|
|
}
|
|
|
|
|
2016-09-17 08:28:23 +00:00
|
|
|
void sbitmap_queue_clear(struct sbitmap_queue *sbq, unsigned int nr,
|
2016-09-17 08:28:24 +00:00
|
|
|
unsigned int cpu)
|
2016-09-17 14:38:44 +00:00
|
|
|
{
|
sbitmap: order READ/WRITE freed instance and setting clear bit
Inside sbitmap_queue_clear(), once the clear bit is set, it will be
visiable to allocation path immediately. Meantime READ/WRITE on old
associated instance(such as request in case of blk-mq) may be
out-of-order with the setting clear bit, so race with re-allocation
may be triggered.
Adds one memory barrier for ordering READ/WRITE of the freed associated
instance with setting clear bit for avoiding race with re-allocation.
The following kernel oops triggerd by block/006 on aarch64 may be fixed:
[ 142.330954] Unable to handle kernel NULL pointer dereference at virtual address 0000000000000330
[ 142.338794] Mem abort info:
[ 142.341554] ESR = 0x96000005
[ 142.344632] Exception class = DABT (current EL), IL = 32 bits
[ 142.350500] SET = 0, FnV = 0
[ 142.353544] EA = 0, S1PTW = 0
[ 142.356678] Data abort info:
[ 142.359528] ISV = 0, ISS = 0x00000005
[ 142.363343] CM = 0, WnR = 0
[ 142.366305] user pgtable: 64k pages, 48-bit VAs, pgdp = 000000002a3c51c0
[ 142.372983] [0000000000000330] pgd=0000000000000000, pud=0000000000000000
[ 142.379777] Internal error: Oops: 96000005 [#1] SMP
[ 142.384613] Modules linked in: null_blk ib_isert iscsi_target_mod ib_srpt target_core_mod ib_srp scsi_transport_srp vfat fat rpcrdma sunrpc rdma_ucm ib_iser rdma_cm iw_cm libiscsi ib_umad scsi_transport_iscsi ib_ipoib ib_cm mlx5_ib ib_uverbs ib_core sbsa_gwdt crct10dif_ce ghash_ce ipmi_ssif sha2_ce ipmi_devintf sha256_arm64 sg sha1_ce ipmi_msghandler ip_tables xfs libcrc32c mlx5_core sdhci_acpi mlxfw ahci_platform at803x sdhci libahci_platform qcom_emac mmc_core hdma hdma_mgmt i2c_dev [last unloaded: null_blk]
[ 142.429753] CPU: 7 PID: 1983 Comm: fio Not tainted 5.0.0.cki #2
[ 142.449458] pstate: 00400005 (nzcv daif +PAN -UAO)
[ 142.454239] pc : __blk_mq_free_request+0x4c/0xa8
[ 142.458830] lr : blk_mq_free_request+0xec/0x118
[ 142.463344] sp : ffff00003360f6a0
[ 142.466646] x29: ffff00003360f6a0 x28: ffff000010e70000
[ 142.471941] x27: ffff801729a50048 x26: 0000000000010000
[ 142.477232] x25: ffff00003360f954 x24: ffff7bdfff021440
[ 142.482529] x23: 0000000000000000 x22: 00000000ffffffff
[ 142.487830] x21: ffff801729810000 x20: 0000000000000000
[ 142.493123] x19: ffff801729a50000 x18: 0000000000000000
[ 142.498413] x17: 0000000000000000 x16: 0000000000000001
[ 142.503709] x15: 00000000000000ff x14: ffff7fe000000000
[ 142.509003] x13: ffff8017dcde09a0 x12: 0000000000000000
[ 142.514308] x11: 0000000000000001 x10: 0000000000000008
[ 142.519597] x9 : ffff8017dcde09a0 x8 : 0000000000002000
[ 142.524889] x7 : ffff8017dcde0a00 x6 : 000000015388f9be
[ 142.530187] x5 : 0000000000000001 x4 : 0000000000000000
[ 142.535478] x3 : 0000000000000000 x2 : 0000000000000000
[ 142.540777] x1 : 0000000000000001 x0 : ffff00001041b194
[ 142.546071] Process fio (pid: 1983, stack limit = 0x000000006460a0ea)
[ 142.552500] Call trace:
[ 142.554926] __blk_mq_free_request+0x4c/0xa8
[ 142.559181] blk_mq_free_request+0xec/0x118
[ 142.563352] blk_mq_end_request+0xfc/0x120
[ 142.567444] end_cmd+0x3c/0xa8 [null_blk]
[ 142.571434] null_complete_rq+0x20/0x30 [null_blk]
[ 142.576194] blk_mq_complete_request+0x108/0x148
[ 142.580797] null_handle_cmd+0x1d4/0x718 [null_blk]
[ 142.585662] null_queue_rq+0x60/0xa8 [null_blk]
[ 142.590171] blk_mq_try_issue_directly+0x148/0x280
[ 142.594949] blk_mq_try_issue_list_directly+0x9c/0x108
[ 142.600064] blk_mq_sched_insert_requests+0xb0/0xd0
[ 142.604926] blk_mq_flush_plug_list+0x16c/0x2a0
[ 142.609441] blk_flush_plug_list+0xec/0x118
[ 142.613608] blk_finish_plug+0x3c/0x4c
[ 142.617348] blkdev_direct_IO+0x3b4/0x428
[ 142.621336] generic_file_read_iter+0x84/0x180
[ 142.625761] blkdev_read_iter+0x50/0x78
[ 142.629579] aio_read.isra.6+0xf8/0x190
[ 142.633409] __io_submit_one.isra.8+0x148/0x738
[ 142.637912] io_submit_one.isra.9+0x88/0xb8
[ 142.642078] __arm64_sys_io_submit+0xe0/0x238
[ 142.646428] el0_svc_handler+0xa0/0x128
[ 142.650238] el0_svc+0x8/0xc
[ 142.653104] Code: b9402a63 f9000a7f 3100047f 540000a0 (f9419a81)
[ 142.659202] ---[ end trace 467586bc175eb09d ]---
Fixes: ea86ea2cdced20057da ("sbitmap: ammortize cost of clearing bits")
Reported-and-bisected_and_tested-by: Yi Zhang <yi.zhang@redhat.com>
Cc: Yi Zhang <yi.zhang@redhat.com>
Cc: "jianchao.wang" <jianchao.w.wang@oracle.com>
Reviewed-by: Omar Sandoval <osandov@fb.com>
Signed-off-by: Ming Lei <ming.lei@redhat.com>
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2019-03-22 01:13:51 +00:00
|
|
|
/*
|
|
|
|
* Once the clear bit is set, the bit may be allocated out.
|
|
|
|
*
|
2021-07-08 01:07:31 +00:00
|
|
|
* Orders READ/WRITE on the associated instance(such as request
|
sbitmap: order READ/WRITE freed instance and setting clear bit
Inside sbitmap_queue_clear(), once the clear bit is set, it will be
visiable to allocation path immediately. Meantime READ/WRITE on old
associated instance(such as request in case of blk-mq) may be
out-of-order with the setting clear bit, so race with re-allocation
may be triggered.
Adds one memory barrier for ordering READ/WRITE of the freed associated
instance with setting clear bit for avoiding race with re-allocation.
The following kernel oops triggerd by block/006 on aarch64 may be fixed:
[ 142.330954] Unable to handle kernel NULL pointer dereference at virtual address 0000000000000330
[ 142.338794] Mem abort info:
[ 142.341554] ESR = 0x96000005
[ 142.344632] Exception class = DABT (current EL), IL = 32 bits
[ 142.350500] SET = 0, FnV = 0
[ 142.353544] EA = 0, S1PTW = 0
[ 142.356678] Data abort info:
[ 142.359528] ISV = 0, ISS = 0x00000005
[ 142.363343] CM = 0, WnR = 0
[ 142.366305] user pgtable: 64k pages, 48-bit VAs, pgdp = 000000002a3c51c0
[ 142.372983] [0000000000000330] pgd=0000000000000000, pud=0000000000000000
[ 142.379777] Internal error: Oops: 96000005 [#1] SMP
[ 142.384613] Modules linked in: null_blk ib_isert iscsi_target_mod ib_srpt target_core_mod ib_srp scsi_transport_srp vfat fat rpcrdma sunrpc rdma_ucm ib_iser rdma_cm iw_cm libiscsi ib_umad scsi_transport_iscsi ib_ipoib ib_cm mlx5_ib ib_uverbs ib_core sbsa_gwdt crct10dif_ce ghash_ce ipmi_ssif sha2_ce ipmi_devintf sha256_arm64 sg sha1_ce ipmi_msghandler ip_tables xfs libcrc32c mlx5_core sdhci_acpi mlxfw ahci_platform at803x sdhci libahci_platform qcom_emac mmc_core hdma hdma_mgmt i2c_dev [last unloaded: null_blk]
[ 142.429753] CPU: 7 PID: 1983 Comm: fio Not tainted 5.0.0.cki #2
[ 142.449458] pstate: 00400005 (nzcv daif +PAN -UAO)
[ 142.454239] pc : __blk_mq_free_request+0x4c/0xa8
[ 142.458830] lr : blk_mq_free_request+0xec/0x118
[ 142.463344] sp : ffff00003360f6a0
[ 142.466646] x29: ffff00003360f6a0 x28: ffff000010e70000
[ 142.471941] x27: ffff801729a50048 x26: 0000000000010000
[ 142.477232] x25: ffff00003360f954 x24: ffff7bdfff021440
[ 142.482529] x23: 0000000000000000 x22: 00000000ffffffff
[ 142.487830] x21: ffff801729810000 x20: 0000000000000000
[ 142.493123] x19: ffff801729a50000 x18: 0000000000000000
[ 142.498413] x17: 0000000000000000 x16: 0000000000000001
[ 142.503709] x15: 00000000000000ff x14: ffff7fe000000000
[ 142.509003] x13: ffff8017dcde09a0 x12: 0000000000000000
[ 142.514308] x11: 0000000000000001 x10: 0000000000000008
[ 142.519597] x9 : ffff8017dcde09a0 x8 : 0000000000002000
[ 142.524889] x7 : ffff8017dcde0a00 x6 : 000000015388f9be
[ 142.530187] x5 : 0000000000000001 x4 : 0000000000000000
[ 142.535478] x3 : 0000000000000000 x2 : 0000000000000000
[ 142.540777] x1 : 0000000000000001 x0 : ffff00001041b194
[ 142.546071] Process fio (pid: 1983, stack limit = 0x000000006460a0ea)
[ 142.552500] Call trace:
[ 142.554926] __blk_mq_free_request+0x4c/0xa8
[ 142.559181] blk_mq_free_request+0xec/0x118
[ 142.563352] blk_mq_end_request+0xfc/0x120
[ 142.567444] end_cmd+0x3c/0xa8 [null_blk]
[ 142.571434] null_complete_rq+0x20/0x30 [null_blk]
[ 142.576194] blk_mq_complete_request+0x108/0x148
[ 142.580797] null_handle_cmd+0x1d4/0x718 [null_blk]
[ 142.585662] null_queue_rq+0x60/0xa8 [null_blk]
[ 142.590171] blk_mq_try_issue_directly+0x148/0x280
[ 142.594949] blk_mq_try_issue_list_directly+0x9c/0x108
[ 142.600064] blk_mq_sched_insert_requests+0xb0/0xd0
[ 142.604926] blk_mq_flush_plug_list+0x16c/0x2a0
[ 142.609441] blk_flush_plug_list+0xec/0x118
[ 142.613608] blk_finish_plug+0x3c/0x4c
[ 142.617348] blkdev_direct_IO+0x3b4/0x428
[ 142.621336] generic_file_read_iter+0x84/0x180
[ 142.625761] blkdev_read_iter+0x50/0x78
[ 142.629579] aio_read.isra.6+0xf8/0x190
[ 142.633409] __io_submit_one.isra.8+0x148/0x738
[ 142.637912] io_submit_one.isra.9+0x88/0xb8
[ 142.642078] __arm64_sys_io_submit+0xe0/0x238
[ 142.646428] el0_svc_handler+0xa0/0x128
[ 142.650238] el0_svc+0x8/0xc
[ 142.653104] Code: b9402a63 f9000a7f 3100047f 540000a0 (f9419a81)
[ 142.659202] ---[ end trace 467586bc175eb09d ]---
Fixes: ea86ea2cdced20057da ("sbitmap: ammortize cost of clearing bits")
Reported-and-bisected_and_tested-by: Yi Zhang <yi.zhang@redhat.com>
Cc: Yi Zhang <yi.zhang@redhat.com>
Cc: "jianchao.wang" <jianchao.w.wang@oracle.com>
Reviewed-by: Omar Sandoval <osandov@fb.com>
Signed-off-by: Ming Lei <ming.lei@redhat.com>
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2019-03-22 01:13:51 +00:00
|
|
|
* of blk_mq) by this bit for avoiding race with re-allocation,
|
|
|
|
* and its pair is the memory barrier implied in __sbitmap_get_word.
|
|
|
|
*
|
|
|
|
* One invariant is that the clear bit has to be zero when the bit
|
|
|
|
* is in use.
|
|
|
|
*/
|
|
|
|
smp_mb__before_atomic();
|
2018-11-30 20:18:06 +00:00
|
|
|
sbitmap_deferred_clear_bit(&sbq->sb, nr);
|
|
|
|
|
2018-05-24 17:00:39 +00:00
|
|
|
/*
|
|
|
|
* Pairs with the memory barrier in set_current_state() to ensure the
|
|
|
|
* proper ordering of clear_bit_unlock()/waitqueue_active() in the waker
|
|
|
|
* and test_and_set_bit_lock()/prepare_to_wait()/finish_wait() in the
|
|
|
|
* waiter. See the comment on waitqueue_active().
|
|
|
|
*/
|
|
|
|
smp_mb__after_atomic();
|
2022-09-09 18:40:22 +00:00
|
|
|
sbitmap_queue_wake_up(sbq, 1);
|
2021-10-08 11:44:23 +00:00
|
|
|
sbitmap_update_cpu_hint(&sbq->sb, cpu, nr);
|
2016-09-17 14:38:44 +00:00
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_queue_clear);
|
|
|
|
|
|
|
|
void sbitmap_queue_wake_all(struct sbitmap_queue *sbq)
|
|
|
|
{
|
|
|
|
int i, wake_index;
|
|
|
|
|
|
|
|
/*
|
2017-01-18 19:55:21 +00:00
|
|
|
* Pairs with the memory barrier in set_current_state() like in
|
2018-05-24 17:00:39 +00:00
|
|
|
* sbitmap_queue_wake_up().
|
2016-09-17 14:38:44 +00:00
|
|
|
*/
|
|
|
|
smp_mb();
|
|
|
|
wake_index = atomic_read(&sbq->wake_index);
|
|
|
|
for (i = 0; i < SBQ_WAIT_QUEUES; i++) {
|
|
|
|
struct sbq_wait_state *ws = &sbq->ws[wake_index];
|
|
|
|
|
|
|
|
if (waitqueue_active(&ws->wait))
|
|
|
|
wake_up(&ws->wait);
|
|
|
|
|
|
|
|
wake_index = sbq_index_inc(wake_index);
|
|
|
|
}
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_queue_wake_all);
|
2017-01-25 22:32:13 +00:00
|
|
|
|
|
|
|
void sbitmap_queue_show(struct sbitmap_queue *sbq, struct seq_file *m)
|
|
|
|
{
|
|
|
|
bool first;
|
|
|
|
int i;
|
|
|
|
|
|
|
|
sbitmap_show(&sbq->sb, m);
|
|
|
|
|
|
|
|
seq_puts(m, "alloc_hint={");
|
|
|
|
first = true;
|
|
|
|
for_each_possible_cpu(i) {
|
|
|
|
if (!first)
|
|
|
|
seq_puts(m, ", ");
|
|
|
|
first = false;
|
2021-01-22 02:33:08 +00:00
|
|
|
seq_printf(m, "%u", *per_cpu_ptr(sbq->sb.alloc_hint, i));
|
2017-01-25 22:32:13 +00:00
|
|
|
}
|
|
|
|
seq_puts(m, "}\n");
|
|
|
|
|
|
|
|
seq_printf(m, "wake_batch=%u\n", sbq->wake_batch);
|
|
|
|
seq_printf(m, "wake_index=%d\n", atomic_read(&sbq->wake_index));
|
2018-11-30 00:36:41 +00:00
|
|
|
seq_printf(m, "ws_active=%d\n", atomic_read(&sbq->ws_active));
|
2017-01-25 22:32:13 +00:00
|
|
|
|
|
|
|
seq_puts(m, "ws={\n");
|
|
|
|
for (i = 0; i < SBQ_WAIT_QUEUES; i++) {
|
|
|
|
struct sbq_wait_state *ws = &sbq->ws[i];
|
sbitmap: Use single per-bitmap counting to wake up queued tags
sbitmap suffers from code complexity, as demonstrated by recent fixes,
and eventual lost wake ups on nested I/O completion. The later happens,
from what I understand, due to the non-atomic nature of the updates to
wait_cnt, which needs to be subtracted and eventually reset when equal
to zero. This two step process can eventually miss an update when a
nested completion happens to interrupt the CPU in between the wait_cnt
updates. This is very hard to fix, as shown by the recent changes to
this code.
The code complexity arises mostly from the corner cases to avoid missed
wakes in this scenario. In addition, the handling of wake_batch
recalculation plus the synchronization with sbq_queue_wake_up is
non-trivial.
This patchset implements the idea originally proposed by Jan [1], which
removes the need for the two-step updates of wait_cnt. This is done by
tracking the number of completions and wakeups in always increasing,
per-bitmap counters. Instead of having to reset the wait_cnt when it
reaches zero, we simply keep counting, and attempt to wake up N threads
in a single wait queue whenever there is enough space for a batch.
Waking up less than batch_wake shouldn't be a problem, because we
haven't changed the conditions for wake up, and the existing batch
calculation guarantees at least enough remaining completions to wake up
a batch for each queue at any time.
Performance-wise, one should expect very similar performance to the
original algorithm for the case where there is no queueing. In both the
old algorithm and this implementation, the first thing is to check
ws_active, which bails out if there is no queueing to be managed. In the
new code, we took care to avoid accounting completions and wakeups when
there is no queueing, to not pay the cost of atomic operations
unnecessarily, since it doesn't skew the numbers.
For more interesting cases, where there is queueing, we need to take
into account the cross-communication of the atomic operations. I've
been benchmarking by running parallel fio jobs against a single hctx
nullb in different hardware queue depth scenarios, and verifying both
IOPS and queueing.
Each experiment was repeated 5 times on a 20-CPU box, with 20 parallel
jobs. fio was issuing fixed-size randwrites with qd=64 against nullb,
varying only the hardware queue length per test.
queue size 2 4 8 16 32 64
6.1-rc2 1681.1K (1.6K) 2633.0K (12.7K) 6940.8K (16.3K) 8172.3K (617.5K) 8391.7K (367.1K) 8606.1K (351.2K)
patched 1721.8K (15.1K) 3016.7K (3.8K) 7543.0K (89.4K) 8132.5K (303.4K) 8324.2K (230.6K) 8401.8K (284.7K)
The following is a similar experiment, ran against a nullb with a single
bitmap shared by 20 hctx spread across 2 NUMA nodes. This has 40
parallel fio jobs operating on the same device
queue size 2 4 8 16 32 64
6.1-rc2 1081.0K (2.3K) 957.2K (1.5K) 1699.1K (5.7K) 6178.2K (124.6K) 12227.9K (37.7K) 13286.6K (92.9K)
patched 1081.8K (2.8K) 1316.5K (5.4K) 2364.4K (1.8K) 6151.4K (20.0K) 11893.6K (17.5K) 12385.6K (18.4K)
It has also survived blktests and a 12h-stress run against nullb. I also
ran the code against nvme and a scsi SSD, and I didn't observe
performance regression in those. If there are other tests you think I
should run, please let me know and I will follow up with results.
[1] https://lore.kernel.org/all/aef9de29-e9f5-259a-f8be-12d1b734e72@google.com/
Cc: Hugh Dickins <hughd@google.com>
Cc: Keith Busch <kbusch@kernel.org>
Cc: Liu Song <liusong@linux.alibaba.com>
Suggested-by: Jan Kara <jack@suse.cz>
Signed-off-by: Gabriel Krisman Bertazi <krisman@suse.de>
Link: https://lore.kernel.org/r/20221105231055.25953-1-krisman@suse.de
Signed-off-by: Jens Axboe <axboe@kernel.dk>
2022-11-05 23:10:55 +00:00
|
|
|
seq_printf(m, "\t{.wait=%s},\n",
|
2017-01-25 22:32:13 +00:00
|
|
|
waitqueue_active(&ws->wait) ? "active" : "inactive");
|
|
|
|
}
|
|
|
|
seq_puts(m, "}\n");
|
|
|
|
|
2021-01-22 02:33:06 +00:00
|
|
|
seq_printf(m, "round_robin=%d\n", sbq->sb.round_robin);
|
2018-05-10 00:16:31 +00:00
|
|
|
seq_printf(m, "min_shallow_depth=%u\n", sbq->min_shallow_depth);
|
2017-01-25 22:32:13 +00:00
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_queue_show);
|
2018-11-30 00:36:41 +00:00
|
|
|
|
2018-12-20 15:49:00 +00:00
|
|
|
void sbitmap_add_wait_queue(struct sbitmap_queue *sbq,
|
|
|
|
struct sbq_wait_state *ws,
|
|
|
|
struct sbq_wait *sbq_wait)
|
|
|
|
{
|
|
|
|
if (!sbq_wait->sbq) {
|
|
|
|
sbq_wait->sbq = sbq;
|
|
|
|
atomic_inc(&sbq->ws_active);
|
2019-12-17 16:00:24 +00:00
|
|
|
add_wait_queue(&ws->wait, &sbq_wait->wait);
|
2018-12-20 15:49:00 +00:00
|
|
|
}
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_add_wait_queue);
|
|
|
|
|
|
|
|
void sbitmap_del_wait_queue(struct sbq_wait *sbq_wait)
|
|
|
|
{
|
|
|
|
list_del_init(&sbq_wait->wait.entry);
|
|
|
|
if (sbq_wait->sbq) {
|
|
|
|
atomic_dec(&sbq_wait->sbq->ws_active);
|
|
|
|
sbq_wait->sbq = NULL;
|
|
|
|
}
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_del_wait_queue);
|
|
|
|
|
2018-11-30 00:36:41 +00:00
|
|
|
void sbitmap_prepare_to_wait(struct sbitmap_queue *sbq,
|
|
|
|
struct sbq_wait_state *ws,
|
|
|
|
struct sbq_wait *sbq_wait, int state)
|
|
|
|
{
|
2018-12-20 15:49:00 +00:00
|
|
|
if (!sbq_wait->sbq) {
|
2018-11-30 00:36:41 +00:00
|
|
|
atomic_inc(&sbq->ws_active);
|
2018-12-20 15:49:00 +00:00
|
|
|
sbq_wait->sbq = sbq;
|
2018-11-30 00:36:41 +00:00
|
|
|
}
|
|
|
|
prepare_to_wait_exclusive(&ws->wait, &sbq_wait->wait, state);
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_prepare_to_wait);
|
|
|
|
|
|
|
|
void sbitmap_finish_wait(struct sbitmap_queue *sbq, struct sbq_wait_state *ws,
|
|
|
|
struct sbq_wait *sbq_wait)
|
|
|
|
{
|
|
|
|
finish_wait(&ws->wait, &sbq_wait->wait);
|
2018-12-20 15:49:00 +00:00
|
|
|
if (sbq_wait->sbq) {
|
2018-11-30 00:36:41 +00:00
|
|
|
atomic_dec(&sbq->ws_active);
|
2018-12-20 15:49:00 +00:00
|
|
|
sbq_wait->sbq = NULL;
|
2018-11-30 00:36:41 +00:00
|
|
|
}
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(sbitmap_finish_wait);
|