| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
ax25: Fix refcount imbalance on inbound connections
When releasing a socket in ax25_release(), we call netdev_put() to
decrease the refcount on the associated ax.25 device. However, the
execution path for accepting an incoming connection never calls
netdev_hold(). This imbalance leads to refcount errors, and ultimately
to kernel crashes.
A typical call trace for the above situation will start with one of the
following errors:
refcount_t: decrement hit 0; leaking memory.
refcount_t: underflow; use-after-free.
And will then have a trace like:
Call Trace:
<TASK>
? show_regs+0x64/0x70
? __warn+0x83/0x120
? refcount_warn_saturate+0xb2/0x100
? report_bug+0x158/0x190
? prb_read_valid+0x20/0x30
? handle_bug+0x3e/0x70
? exc_invalid_op+0x1c/0x70
? asm_exc_invalid_op+0x1f/0x30
? refcount_warn_saturate+0xb2/0x100
? refcount_warn_saturate+0xb2/0x100
ax25_release+0x2ad/0x360
__sock_release+0x35/0xa0
sock_close+0x19/0x20
[...]
On reboot (or any attempt to remove the interface), the kernel gets
stuck in an infinite loop:
unregister_netdevice: waiting for ax0 to become free. Usage count = 0
This patch corrects these issues by ensuring that we call netdev_hold()
and ax25_dev_hold() for new connections in ax25_accept(). This makes the
logic leading to ax25_accept() match the logic for ax25_bind(): in both
cases we increment the refcount, which is ultimately decremented in
ax25_release(). |
| In the Linux kernel, the following vulnerability has been resolved:
ionic: fix kernel panic in XDP_TX action
In the XDP_TX path, ionic driver sends a packet to the TX path with rx
page and corresponding dma address.
After tx is done, ionic_tx_clean() frees that page.
But RX ring buffer isn't reset to NULL.
So, it uses a freed page, which causes kernel panic.
BUG: unable to handle page fault for address: ffff8881576c110c
PGD 773801067 P4D 773801067 PUD 87f086067 PMD 87efca067 PTE 800ffffea893e060
Oops: Oops: 0000 [#1] PREEMPT SMP DEBUG_PAGEALLOC KASAN NOPTI
CPU: 1 PID: 25 Comm: ksoftirqd/1 Not tainted 6.9.0+ #11
Hardware name: ASUS System Product Name/PRIME Z690-P D4, BIOS 0603 11/01/2021
RIP: 0010:bpf_prog_f0b8caeac1068a55_balancer_ingress+0x3b/0x44f
Code: 00 53 41 55 41 56 41 57 b8 01 00 00 00 48 8b 5f 08 4c 8b 77 00 4c 89 f7 48 83 c7 0e 48 39 d8
RSP: 0018:ffff888104e6fa28 EFLAGS: 00010283
RAX: 0000000000000002 RBX: ffff8881576c1140 RCX: 0000000000000002
RDX: ffffffffc0051f64 RSI: ffffc90002d33048 RDI: ffff8881576c110e
RBP: ffff888104e6fa88 R08: 0000000000000000 R09: ffffed1027a04a23
R10: 0000000000000000 R11: 0000000000000000 R12: ffff8881b03a21a8
R13: ffff8881589f800f R14: ffff8881576c1100 R15: 00000001576c1100
FS: 0000000000000000(0000) GS:ffff88881ae00000(0000) knlGS:0000000000000000
CS: 0010 DS: 0000 ES: 0000 CR0: 0000000080050033
CR2: ffff8881576c110c CR3: 0000000767a90000 CR4: 00000000007506f0
PKRU: 55555554
Call Trace:
<TASK>
? __die+0x20/0x70
? page_fault_oops+0x254/0x790
? __pfx_page_fault_oops+0x10/0x10
? __pfx_is_prefetch.constprop.0+0x10/0x10
? search_bpf_extables+0x165/0x260
? fixup_exception+0x4a/0x970
? exc_page_fault+0xcb/0xe0
? asm_exc_page_fault+0x22/0x30
? 0xffffffffc0051f64
? bpf_prog_f0b8caeac1068a55_balancer_ingress+0x3b/0x44f
? do_raw_spin_unlock+0x54/0x220
ionic_rx_service+0x11ab/0x3010 [ionic 9180c3001ab627d82bbc5f3ebe8a0decaf6bb864]
? ionic_tx_clean+0x29b/0xc60 [ionic 9180c3001ab627d82bbc5f3ebe8a0decaf6bb864]
? __pfx_ionic_tx_clean+0x10/0x10 [ionic 9180c3001ab627d82bbc5f3ebe8a0decaf6bb864]
? __pfx_ionic_rx_service+0x10/0x10 [ionic 9180c3001ab627d82bbc5f3ebe8a0decaf6bb864]
? ionic_tx_cq_service+0x25d/0xa00 [ionic 9180c3001ab627d82bbc5f3ebe8a0decaf6bb864]
? __pfx_ionic_rx_service+0x10/0x10 [ionic 9180c3001ab627d82bbc5f3ebe8a0decaf6bb864]
ionic_cq_service+0x69/0x150 [ionic 9180c3001ab627d82bbc5f3ebe8a0decaf6bb864]
ionic_txrx_napi+0x11a/0x540 [ionic 9180c3001ab627d82bbc5f3ebe8a0decaf6bb864]
__napi_poll.constprop.0+0xa0/0x440
net_rx_action+0x7e7/0xc30
? __pfx_net_rx_action+0x10/0x10 |
| In the Linux kernel, the following vulnerability has been resolved:
scsi: mpt3sas: Avoid test/set_bit() operating in non-allocated memory
There is a potential out-of-bounds access when using test_bit() on a single
word. The test_bit() and set_bit() functions operate on long values, and
when testing or setting a single word, they can exceed the word
boundary. KASAN detects this issue and produces a dump:
BUG: KASAN: slab-out-of-bounds in _scsih_add_device.constprop.0 (./arch/x86/include/asm/bitops.h:60 ./include/asm-generic/bitops/instrumented-atomic.h:29 drivers/scsi/mpt3sas/mpt3sas_scsih.c:7331) mpt3sas
Write of size 8 at addr ffff8881d26e3c60 by task kworker/u1536:2/2965
For full log, please look at [1].
Make the allocation at least the size of sizeof(unsigned long) so that
set_bit() and test_bit() have sufficient room for read/write operations
without overwriting unallocated memory.
[1] Link: https://lore.kernel.org/all/ZkNcALr3W3KGYYJG@gmail.com/ |
| In the Linux kernel, the following vulnerability has been resolved:
io_uring/io-wq: Use set_bit() and test_bit() at worker->flags
Utilize set_bit() and test_bit() on worker->flags within io_uring/io-wq
to address potential data races.
The structure io_worker->flags may be accessed through various data
paths, leading to concurrency issues. When KCSAN is enabled, it reveals
data races occurring in io_worker_handle_work and
io_wq_activate_free_worker functions.
BUG: KCSAN: data-race in io_worker_handle_work / io_wq_activate_free_worker
write to 0xffff8885c4246404 of 4 bytes by task 49071 on cpu 28:
io_worker_handle_work (io_uring/io-wq.c:434 io_uring/io-wq.c:569)
io_wq_worker (io_uring/io-wq.c:?)
<snip>
read to 0xffff8885c4246404 of 4 bytes by task 49024 on cpu 5:
io_wq_activate_free_worker (io_uring/io-wq.c:? io_uring/io-wq.c:285)
io_wq_enqueue (io_uring/io-wq.c:947)
io_queue_iowq (io_uring/io_uring.c:524)
io_req_task_submit (io_uring/io_uring.c:1511)
io_handle_tw_list (io_uring/io_uring.c:1198)
<snip>
Line numbers against commit 18daea77cca6 ("Merge tag 'for-linus' of
git://git.kernel.org/pub/scm/virt/kvm/kvm").
These races involve writes and reads to the same memory location by
different tasks running on different CPUs. To mitigate this, refactor
the code to use atomic operations such as set_bit(), test_bit(), and
clear_bit() instead of basic "and" and "or" operations. This ensures
thread-safe manipulation of worker flags.
Also, move `create_index` to avoid holes in the structure. |
| In the Linux kernel, the following vulnerability has been resolved:
net: hns3: fix kernel crash problem in concurrent scenario
When link status change, the nic driver need to notify the roce
driver to handle this event, but at this time, the roce driver
may uninit, then cause kernel crash.
To fix the problem, when link status change, need to check
whether the roce registered, and when uninit, need to wait link
update finish. |
| In the Linux kernel, the following vulnerability has been resolved:
netfilter: ipset: Fix race between namespace cleanup and gc in the list:set type
Lion Ackermann reported that there is a race condition between namespace cleanup
in ipset and the garbage collection of the list:set type. The namespace
cleanup can destroy the list:set type of sets while the gc of the set type is
waiting to run in rcu cleanup. The latter uses data from the destroyed set which
thus leads use after free. The patch contains the following parts:
- When destroying all sets, first remove the garbage collectors, then wait
if needed and then destroy the sets.
- Fix the badly ordered "wait then remove gc" for the destroy a single set
case.
- Fix the missing rcu locking in the list:set type in the userspace test
case.
- Use proper RCU list handlings in the list:set type.
The patch depends on c1193d9bbbd3 (netfilter: ipset: Add list flush to cancel_gc). |
| In the Linux kernel, the following vulnerability has been resolved:
sock_map: avoid race between sock_map_close and sk_psock_put
sk_psock_get will return NULL if the refcount of psock has gone to 0, which
will happen when the last call of sk_psock_put is done. However,
sk_psock_drop may not have finished yet, so the close callback will still
point to sock_map_close despite psock being NULL.
This can be reproduced with a thread deleting an element from the sock map,
while the second one creates a socket, adds it to the map and closes it.
That will trigger the WARN_ON_ONCE:
------------[ cut here ]------------
WARNING: CPU: 1 PID: 7220 at net/core/sock_map.c:1701 sock_map_close+0x2a2/0x2d0 net/core/sock_map.c:1701
Modules linked in:
CPU: 1 PID: 7220 Comm: syz-executor380 Not tainted 6.9.0-syzkaller-07726-g3c999d1ae3c7 #0
Hardware name: Google Google Compute Engine/Google Compute Engine, BIOS Google 04/02/2024
RIP: 0010:sock_map_close+0x2a2/0x2d0 net/core/sock_map.c:1701
Code: df e8 92 29 88 f8 48 8b 1b 48 89 d8 48 c1 e8 03 42 80 3c 20 00 74 08 48 89 df e8 79 29 88 f8 4c 8b 23 eb 89 e8 4f 15 23 f8 90 <0f> 0b 90 48 83 c4 08 5b 41 5c 41 5d 41 5e 41 5f 5d e9 13 26 3d 02
RSP: 0018:ffffc9000441fda8 EFLAGS: 00010293
RAX: ffffffff89731ae1 RBX: ffffffff94b87540 RCX: ffff888029470000
RDX: 0000000000000000 RSI: ffffffff8bcab5c0 RDI: ffffffff8c1faba0
RBP: 0000000000000000 R08: ffffffff92f9b61f R09: 1ffffffff25f36c3
R10: dffffc0000000000 R11: fffffbfff25f36c4 R12: ffffffff89731840
R13: ffff88804b587000 R14: ffff88804b587000 R15: ffffffff89731870
FS: 000055555e080380(0000) GS:ffff8880b9500000(0000) knlGS:0000000000000000
CS: 0010 DS: 0000 ES: 0000 CR0: 0000000080050033
CR2: 0000000000000000 CR3: 00000000207d4000 CR4: 0000000000350ef0
Call Trace:
<TASK>
unix_release+0x87/0xc0 net/unix/af_unix.c:1048
__sock_release net/socket.c:659 [inline]
sock_close+0xbe/0x240 net/socket.c:1421
__fput+0x42b/0x8a0 fs/file_table.c:422
__do_sys_close fs/open.c:1556 [inline]
__se_sys_close fs/open.c:1541 [inline]
__x64_sys_close+0x7f/0x110 fs/open.c:1541
do_syscall_x64 arch/x86/entry/common.c:52 [inline]
do_syscall_64+0xf5/0x240 arch/x86/entry/common.c:83
entry_SYSCALL_64_after_hwframe+0x77/0x7f
RIP: 0033:0x7fb37d618070
Code: 00 00 48 c7 c2 b8 ff ff ff f7 d8 64 89 02 b8 ff ff ff ff eb d4 e8 10 2c 00 00 80 3d 31 f0 07 00 00 74 17 b8 03 00 00 00 0f 05 <48> 3d 00 f0 ff ff 77 48 c3 0f 1f 80 00 00 00 00 48 83 ec 18 89 7c
RSP: 002b:00007ffcd4a525d8 EFLAGS: 00000202 ORIG_RAX: 0000000000000003
RAX: ffffffffffffffda RBX: 0000000000000005 RCX: 00007fb37d618070
RDX: 0000000000000010 RSI: 00000000200001c0 RDI: 0000000000000004
RBP: 0000000000000000 R08: 0000000100000000 R09: 0000000100000000
R10: 0000000000000000 R11: 0000000000000202 R12: 0000000000000000
R13: 0000000000000000 R14: 0000000000000000 R15: 0000000000000000
</TASK>
Use sk_psock, which will only check that the pointer is not been set to
NULL yet, which should only happen after the callbacks are restored. If,
then, a reference can still be gotten, we may call sk_psock_stop and cancel
psock->work.
As suggested by Paolo Abeni, reorder the condition so the control flow is
less convoluted.
After that change, the reproducer does not trigger the WARN_ON_ONCE
anymore. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/drm_file: Fix pid refcounting race
<maarten.lankhorst@linux.intel.com>, Maxime Ripard
<mripard@kernel.org>, Thomas Zimmermann <tzimmermann@suse.de>
filp->pid is supposed to be a refcounted pointer; however, before this
patch, drm_file_update_pid() only increments the refcount of a struct
pid after storing a pointer to it in filp->pid and dropping the
dev->filelist_mutex, making the following race possible:
process A process B
========= =========
begin drm_file_update_pid
mutex_lock(&dev->filelist_mutex)
rcu_replace_pointer(filp->pid, <pid B>, 1)
mutex_unlock(&dev->filelist_mutex)
begin drm_file_update_pid
mutex_lock(&dev->filelist_mutex)
rcu_replace_pointer(filp->pid, <pid A>, 1)
mutex_unlock(&dev->filelist_mutex)
get_pid(<pid A>)
synchronize_rcu()
put_pid(<pid B>) *** pid B reaches refcount 0 and is freed here ***
get_pid(<pid B>) *** UAF ***
synchronize_rcu()
put_pid(<pid A>)
As far as I know, this race can only occur with CONFIG_PREEMPT_RCU=y
because it requires RCU to detect a quiescent state in code that is not
explicitly calling into the scheduler.
This race leads to use-after-free of a "struct pid".
It is probably somewhat hard to hit because process A has to pass
through a synchronize_rcu() operation while process B is between
mutex_unlock() and get_pid().
Fix it by ensuring that by the time a pointer to the current task's pid
is stored in the file, an extra reference to the pid has been taken.
This fix also removes the condition for synchronize_rcu(); I think
that optimization is unnecessary complexity, since in that case we
would usually have bailed out on the lockless check above. |
| In the Linux kernel, the following vulnerability has been resolved:
KVM: SVM: WARN on vNMI + NMI window iff NMIs are outright masked
When requesting an NMI window, WARN on vNMI support being enabled if and
only if NMIs are actually masked, i.e. if the vCPU is already handling an
NMI. KVM's ABI for NMIs that arrive simultanesouly (from KVM's point of
view) is to inject one NMI and pend the other. When using vNMI, KVM pends
the second NMI simply by setting V_NMI_PENDING, and lets the CPU do the
rest (hardware automatically sets V_NMI_BLOCKING when an NMI is injected).
However, if KVM can't immediately inject an NMI, e.g. because the vCPU is
in an STI shadow or is running with GIF=0, then KVM will request an NMI
window and trigger the WARN (but still function correctly).
Whether or not the GIF=0 case makes sense is debatable, as the intent of
KVM's behavior is to provide functionality that is as close to real
hardware as possible. E.g. if two NMIs are sent in quick succession, the
probability of both NMIs arriving in an STI shadow is infinitesimally low
on real hardware, but significantly larger in a virtual environment, e.g.
if the vCPU is preempted in the STI shadow. For GIF=0, the argument isn't
as clear cut, because the window where two NMIs can collide is much larger
in bare metal (though still small).
That said, KVM should not have divergent behavior for the GIF=0 case based
on whether or not vNMI support is enabled. And KVM has allowed
simultaneous NMIs with GIF=0 for over a decade, since commit 7460fb4a3400
("KVM: Fix simultaneous NMIs"). I.e. KVM's GIF=0 handling shouldn't be
modified without a *really* good reason to do so, and if KVM's behavior
were to be modified, it should be done irrespective of vNMI support. |
| In the Linux kernel, the following vulnerability has been resolved:
bcache: fix variable length array abuse in btree_iter
btree_iter is used in two ways: either allocated on the stack with a
fixed size MAX_BSETS, or from a mempool with a dynamic size based on the
specific cache set. Previously, the struct had a fixed-length array of
size MAX_BSETS which was indexed out-of-bounds for the dynamically-sized
iterators, which causes UBSAN to complain.
This patch uses the same approach as in bcachefs's sort_iter and splits
the iterator into a btree_iter with a flexible array member and a
btree_iter_stack which embeds a btree_iter as well as a fixed-length
data array. |
| In the Linux kernel, the following vulnerability has been resolved:
media: mc: Fix graph walk in media_pipeline_start
The graph walk tries to follow all links, even if they are not between
pads. This causes a crash with, e.g. a MEDIA_LNK_FL_ANCILLARY_LINK link.
Fix this by allowing the walk to proceed only for MEDIA_LNK_FL_DATA_LINK
links. |
| In the Linux kernel, the following vulnerability has been resolved:
kdb: Fix buffer overflow during tab-complete
Currently, when the user attempts symbol completion with the Tab key, kdb
will use strncpy() to insert the completed symbol into the command buffer.
Unfortunately it passes the size of the source buffer rather than the
destination to strncpy() with predictably horrible results. Most obviously
if the command buffer is already full but cp, the cursor position, is in
the middle of the buffer, then we will write past the end of the supplied
buffer.
Fix this by replacing the dubious strncpy() calls with memmove()/memcpy()
calls plus explicit boundary checks to make sure we have enough space
before we start moving characters around. |
| In the Linux kernel, the following vulnerability has been resolved:
crypto: starfive - Do not free stack buffer
RSA text data uses variable length buffer allocated in software stack.
Calling kfree on it causes undefined behaviour in subsequent operations. |
| In the Linux kernel, the following vulnerability has been resolved:
mm/hugetlb: do not call vma_add_reservation upon ENOMEM
sysbot reported a splat [1] on __unmap_hugepage_range(). This is because
vma_needs_reservation() can return -ENOMEM if
allocate_file_region_entries() fails to allocate the file_region struct
for the reservation.
Check for that and do not call vma_add_reservation() if that is the case,
otherwise region_abort() and region_del() will see that we do not have any
file_regions.
If we detect that vma_needs_reservation() returned -ENOMEM, we clear the
hugetlb_restore_reserve flag as if this reservation was still consumed, so
free_huge_folio() will not increment the resv count.
[1] https://lore.kernel.org/linux-mm/0000000000004096100617c58d54@google.com/T/#ma5983bc1ab18a54910da83416b3f89f3c7ee43aa |
| In the Linux kernel, the following vulnerability has been resolved:
xfs: fix log recovery buffer allocation for the legacy h_size fixup
Commit a70f9fe52daa ("xfs: detect and handle invalid iclog size set by
mkfs") added a fixup for incorrect h_size values used for the initial
umount record in old xfsprogs versions. Later commit 0c771b99d6c9
("xfs: clean up calculation of LR header blocks") cleaned up the log
reover buffer calculation, but stoped using the fixed up h_size value
to size the log recovery buffer, which can lead to an out of bounds
access when the incorrect h_size does not come from the old mkfs
tool, but a fuzzer.
Fix this by open coding xlog_logrec_hblks and taking the fixed h_size
into account for this calculation. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/amdgpu: add error handle to avoid out-of-bounds
if the sdma_v4_0_irq_id_to_seq return -EINVAL, the process should
be stop to avoid out-of-bounds read, so directly return -EINVAL. |
| In the Linux kernel, the following vulnerability has been resolved:
smb: client: fix deadlock in smb2_find_smb_tcon()
Unlock cifs_tcp_ses_lock before calling cifs_put_smb_ses() to avoid such
deadlock. |
| In the Linux kernel, the following vulnerability has been resolved:
f2fs: fix to do sanity check on i_xattr_nid in sanity_check_inode()
syzbot reports a kernel bug as below:
F2FS-fs (loop0): Mounted with checkpoint version = 48b305e4
==================================================================
BUG: KASAN: slab-out-of-bounds in f2fs_test_bit fs/f2fs/f2fs.h:2933 [inline]
BUG: KASAN: slab-out-of-bounds in current_nat_addr fs/f2fs/node.h:213 [inline]
BUG: KASAN: slab-out-of-bounds in f2fs_get_node_info+0xece/0x1200 fs/f2fs/node.c:600
Read of size 1 at addr ffff88807a58c76c by task syz-executor280/5076
CPU: 1 PID: 5076 Comm: syz-executor280 Not tainted 6.9.0-rc5-syzkaller #0
Hardware name: Google Google Compute Engine/Google Compute Engine, BIOS Google 03/27/2024
Call Trace:
<TASK>
__dump_stack lib/dump_stack.c:88 [inline]
dump_stack_lvl+0x241/0x360 lib/dump_stack.c:114
print_address_description mm/kasan/report.c:377 [inline]
print_report+0x169/0x550 mm/kasan/report.c:488
kasan_report+0x143/0x180 mm/kasan/report.c:601
f2fs_test_bit fs/f2fs/f2fs.h:2933 [inline]
current_nat_addr fs/f2fs/node.h:213 [inline]
f2fs_get_node_info+0xece/0x1200 fs/f2fs/node.c:600
f2fs_xattr_fiemap fs/f2fs/data.c:1848 [inline]
f2fs_fiemap+0x55d/0x1ee0 fs/f2fs/data.c:1925
ioctl_fiemap fs/ioctl.c:220 [inline]
do_vfs_ioctl+0x1c07/0x2e50 fs/ioctl.c:838
__do_sys_ioctl fs/ioctl.c:902 [inline]
__se_sys_ioctl+0x81/0x170 fs/ioctl.c:890
do_syscall_x64 arch/x86/entry/common.c:52 [inline]
do_syscall_64+0xf5/0x240 arch/x86/entry/common.c:83
entry_SYSCALL_64_after_hwframe+0x77/0x7f
The root cause is we missed to do sanity check on i_xattr_nid during
f2fs_iget(), so that in fiemap() path, current_nat_addr() will access
nat_bitmap w/ offset from invalid i_xattr_nid, result in triggering
kasan bug report, fix it. |
| In the Linux kernel, the following vulnerability has been resolved:
Revert "xsk: Support redirect to any socket bound to the same umem"
This reverts commit 2863d665ea41282379f108e4da6c8a2366ba66db.
This patch introduced a potential kernel crash when multiple napi instances
redirect to the same AF_XDP socket. By removing the queue_index check, it is
possible for multiple napi instances to access the Rx ring at the same time,
which will result in a corrupted ring state which can lead to a crash when
flushing the rings in __xsk_flush(). This can happen when the linked list of
sockets to flush gets corrupted by concurrent accesses. A quick and small fix
is not possible, so let us revert this for now. |
| In the Linux kernel, the following vulnerability has been resolved:
um: Add winch to winch_handlers before registering winch IRQ
Registering a winch IRQ is racy, an interrupt may occur before the winch is
added to the winch_handlers list.
If that happens, register_winch_irq() adds to that list a winch that is
scheduled to be (or has already been) freed, causing a panic later in
winch_cleanup().
Avoid the race by adding the winch to the winch_handlers list before
registering the IRQ, and rolling back if um_request_irq() fails. |
