| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| A use-after-free issue was addressed with improved memory management. This issue is fixed in Safari 26.5.2, iOS 26.5.2 and iPadOS 26.5.2, macOS Tahoe 26.5.2, tvOS 26.6, visionOS 26.6, watchOS 26.6. Processing maliciously crafted web content may lead to an unexpected process crash. |
| A use-after-free issue was addressed with improved memory management. This issue is fixed in Safari 26.5.2, iOS 26.5.2 and iPadOS 26.5.2, macOS Tahoe 26.5.2, tvOS 26.6, visionOS 26.6, watchOS 26.6. Processing maliciously crafted web content may lead to memory corruption. |
| Sandbox escape due to invalid pointer in the Disability Access APIs component. This vulnerability was fixed in Firefox 153 and Thunderbird 153. |
| Software installed and run as a non-privileged user may conduct improper GPU system calls to manipulate the lifetimes of synchronisation objects in the kernel, leading to read/write UAFs.
During workload submission involving a fence exported by the GPU driver, the reference count of the underlying synchronisation primitive is not properly incremented. This can be exploited, by destroying the exported fence and prematurely release the underlying primitive, resulting in a potential use-after-free condition. |
| A use-after-free flaw was found in the X.Org X server and Xwayland in CreateSaverWindow(). A client can trigger a use-after-free read after changing window attributes and forcing the screen saver, leading to information disclosure. |
| A use-after-free flaw was found in the X.Org X server and Xwayland in SyncChangeCounter(). A client that sets up multiple SyncCounters can trigger a use-after-free when destroying those counters via a second client connection while changing those counters. This may be used to crash the server, or for privilege escalation if the X server runs as root. |
| A use-after-free flaw was found in the X.Org X server and Xwayland in FreeCounter(). A client that sets up multiple SyncCounters and awaits on those triggers can trigger a use-after-free when destroying those counters via a second client connection. This may be used to crash the server, or for privilege escalation if the X server runs as root. |
| A use-after-free flaw was found in the X.Org X server and Xwayland in miSyncDestroyFence(). A client that sets up multiple fence triggers can trigger a use-after-free function pointer call. An attacker would connect to the X server to set up a fence and await that fence, then a second X connection destroys the fence, causing the use-after-free. This may be used to crash the server, or for privilege escalation if the X server runs as root. |
| Use after free in Blink in Google Chrome prior to 150.0.7871.186 allowed a remote attacker to execute arbitrary code inside a sandbox via a crafted HTML page. (Chromium security severity: High) |
| In the Linux kernel, the following vulnerability has been resolved:
fuse: clear intr_entry in fuse_resend and fuse_remove_pending_req
When fuse_resend() moves a request from fpq->processing back to
fiq->pending, it sets FR_PENDING and clears FR_SENT but does not
remove the requests intr_entry from fiq->interrupts. If the
request had FR_INTERRUPTED set from a prior signal, intr_entry
remains dangling on fiq->interrupts. When the requesting task
then receives a fatal signal, fuse_remove_pending_req() sees
FR_PENDING=1, removes the request from fiq->pending and frees it
via the refcount path, also without cleaning intr_entry. The
stale intr_entry causes use-after-free when fuse_read_interrupt()
iterates fiq->interrupts:
- list_del_init(&req->intr_entry) -> UAF write on freed slab
- req->in.h.unique -> UAF read, data leaked to userspace
Remove intr_entry from fiq->interrupts in fuse_resend() for
interrupted requests before they are placed back on fiq->pending.
Add a WARN_ON if the intr_entry is not empty on request destruction. |
| In the Linux kernel, the following vulnerability has been resolved:
smb: client: fix change notify replay double-free
A response-bearing attempt can return a replayable error and free its
response buffer. If SMB2_notify_init() fails before the next send, cleanup
retains the previous buffer type and frees that response again.
Reset response bookkeeping before each attempt to prevent the stale free. |
| In the Linux kernel, the following vulnerability has been resolved:
usb: xhci: Fix sleep in atomic context in xhci_free_streams()
When a USB device with active stream endpoints is disconnected,
xhci_free_streams() is called from the hub_event workqueue to
free the stream resources. It calls xhci_free_stream_info()
while holding xhci->lock with irqs disabled.
xhci_free_stream_info() invokes xhci_free_stream_ctx(), which
calls dma_free_coherent() for large stream context arrays.
dma_free_coherent() can sleep (e.g. via vunmap), triggering
a BUG when called from atomic context.
Call trace:
dma_free_attrs+0x174/0x220
xhci_free_stream_info+0xd0/0x11c
xhci_free_streams+0x278/0x37c
usb_free_streams+0x98/0xc0
usb_unbind_interface+0x1b8/0x2f8
device_release_driver_internal+0x1d4/0x2cc
device_release_driver+0x18/0x28
bus_remove_device+0x160/0x1a4
device_del+0x1ec/0x350
usb_disable_device+0x98/0x214
usb_disconnect+0xf0/0x35c
hub_event+0xab4/0x19ec
process_one_work+0x278/0x63c
Fix this by saving the stream_info pointers and clearing the
ep references under the lock, then calling xhci_free_stream_info()
outside the lock where sleeping is allowed. |
| In the Linux kernel, the following vulnerability has been resolved:
ksmbd: fix UAF of struct file_lock in SMB2_LOCK deferred-lock cancellation
When a blocking byte-range lock request is deferred in the
FILE_LOCK_DEFERRED path, ksmbd registers the asynchronous work into
the connection's async_requests list via setup_async_work(). The cancel
callback smb2_remove_blocked_lock() holds a reference to the flock.
If the lock waiter is subsequently woken up but the work state is no
longer KSMBD_WORK_ACTIVE (e.g., due to a concurrent cancellation), the
cleanup path calls locks_free_lock(flock) without dequeuing the work from
the async_requests list. Concurrently, smb2_cancel() walks the list
under conn->request_lock and invokes the cancel callback, which then
dereferences the already freed 'flock'. This leads to a slab-use-after-free
inside __wake_up_common.
Fix this by restructuring the cleanup logic after the worker returns
from ksmbd_vfs_posix_lock_wait(). Move list_del(&smb_lock->llist) and
release_async_work(work) to the top of the cleanup block. This guarantees
that the async work is completely dequeued and serialized under
conn->request_lock before locks_free_lock(flock) is called, rendering
the flock unreachable for any concurrent smb2_cancel(). |
| In the Linux kernel, the following vulnerability has been resolved:
KVM: x86: hyper-v: Bound the bank index when querying sparse banks
When checking if a VP ID is included in a sparse bank set, explicitly check
that the ID can actually be contained in a sparse bank (the TLFS allows for
a maximum of 64 banks of 64 vCPUs each). When handling a paravirtual TLB
flush for L2, the VP ID is copied verbatim from the enlightened VMCS,
without any bounds check, i.e. isn't guaranteed to be under the limit of
4096.
Failure to check the bounds of the VP ID leads to an out-of-bounds read
when testing the sparse bank, and super strictly speaking could lead to KVM
performing an unnecessary TLB flush for an L2 vCPU.
==================================================================
BUG: KASAN: use-after-free in hv_is_vp_in_sparse_set+0x85/0x100 [kvm]
Read of size 8 at addr ffff88811ba5f598 by task hyperv_evmcs/2802
CPU: 12 UID: 1000 PID: 2802 Comm: hyperv_evmcs Not tainted 7.1.0-rc2 #7 PREEMPT
Hardware name: QEMU Standard PC (Q35 + ICH9, 2009), BIOS 0.0.0 02/06/2015
Call Trace:
<TASK>
dump_stack_lvl+0x51/0x60
print_report+0xcb/0x5d0
kasan_report+0xb4/0xe0
kasan_check_range+0x35/0x1b0
hv_is_vp_in_sparse_set+0x85/0x100 [kvm]
kvm_hv_flush_tlb+0xe9e/0x16c0 [kvm]
kvm_hv_hypercall+0xe6b/0x1e60 [kvm]
vmx_handle_exit+0x485/0x1b60 [kvm_intel]
kvm_arch_vcpu_ioctl_run+0x22e3/0x5070 [kvm]
kvm_vcpu_ioctl+0x5d0/0x10c0 [kvm]
__x64_sys_ioctl+0x129/0x1a0
do_syscall_64+0xb9/0xcf0
entry_SYSCALL_64_after_hwframe+0x4b/0x53
RIP: 0033:0x7f0e62d1a9bf
</TASK>
The buggy address belongs to the physical page:
page: refcount:0 mapcount:0 mapping:0000000000000000 index:0xffffffffffffffff pfn:0x11ba5f
flags: 0x4000000000000000(zone=1)
raw: 4000000000000000 0000000000000000 00000000ffffffff 0000000000000000
raw: ffffffffffffffff 0000000000000000 00000000ffffffff 0000000000000000
page dumped because: kasan: bad access detected
Memory state around the buggy address:
ffff88811ba5f480: ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff
ffff88811ba5f500: ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff
>ffff88811ba5f580: ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff
^
ffff88811ba5f600: ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff
ffff88811ba5f680: ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff ff
==================================================================
Disabling lock debugging due to kernel taint
Opportunistically add a compile time assertion to ensure the maximum number
of sparse banks exactly matches the number of possible bits in the passed
in mask.
[sean: add KASAN splat, drop comment, add assert, massage changelog] |
| Use after free in GPU in Google Chrome on Android prior to 150.0.7871.125 allowed a remote attacker who had compromised the renderer process to potentially perform a sandbox escape via a crafted HTML page. (Chromium security severity: High) |
| Use after free in Core in Google Chrome on Windows prior to 150.0.7871.125 allowed a remote attacker to potentially perform a sandbox escape via a crafted HTML page. (Chromium security severity: High) |
| Use after free in Cast in Google Chrome prior to 150.0.7871.128 allowed a remote attacker to execute arbitrary code inside a sandbox via a crafted HTML page. (Chromium security severity: High) |
| In the Linux kernel, the following vulnerability has been resolved:
crypto: qat - protect service table iterations with service_lock
The service_table list is protected by service_lock when entries are
added or removed (in adf_service_add() and adf_service_remove()), but
several functions iterate over the list without holding this lock.
A concurrent adf_service_register() or adf_service_unregister() call
could modify the list during traversal, leading to list corruption or
a use-after-free.
Fix this by holding service_lock across all list_for_each_entry()
iterations of service_table in adf_dev_init(), adf_dev_start(),
adf_dev_stop(), adf_dev_shutdown(), adf_dev_restarting_notify(),
adf_dev_restarted_notify(), and adf_error_notifier().
The lock ordering is safe: callers of the static helpers (adf_dev_up()
and adf_dev_down()) acquire state_lock before service_lock, and no
event_hld callback or service_lock holder ever acquires state_lock in
the reverse order. |
| In the Linux kernel, the following vulnerability has been resolved:
USB: iowarrior: fix use-after-free on disconnect race
mutex_unlock() may access the mutex structure after releasing the lock
and therefore cannot be used to manage lifetime of objects directly
(unlike spinlocks and refcounts). [1][2]
Use a kref to release the driver data to avoid use-after-free in
mutex_unlock() when release() races with disconnect().
[1] a51749ab34d9 ("locking/mutex: Document that mutex_unlock() is non-atomic")
[2] 2b9d9e0a9ba0 ("locking/mutex: Clarify that mutex_unlock(), and most
other sleeping locks, can still use the lock object
after it's unlocked") |
| Use after free in Views in Google Chrome prior to 150.0.7871.47 allowed a remote attacker who convinced a user to engage in specific UI gestures to potentially exploit heap corruption via a crafted HTML page. (Chromium security severity: Critical) |
