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Search Results (147 CVEs found)
| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-74969 | 1 Mozilla | 2 Firefox, Thunderbird | 2026-08-19 | 8.8 High |
| Use-after-free in the Layout: Text and Fonts component. This vulnerability was fixed in Firefox 154, Firefox ESR 115.39, Firefox ESR 140.14, Firefox ESR 153.1, Thunderbird 154, Thunderbird 140.14, and Thunderbird 153.1. | ||||
| CVE-2026-72119 | 1 Linux | 1 Linux Kernel | 2026-08-19 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: can: bcm: extend bcm_tx_lock usage for data and timer updates Stage new CAN frame content for an existing tx op into a kmalloc()'d buffer and validate it there, mirroring the approach already used in bcm_rx_setup(). Only copy the validated data into op->frames while holding op->bcm_tx_lock, so bcm_can_tx() and bcm_tx_timeout_handler() can no longer observe a partially updated or unvalidated frame. Add a missing error path for memcpy_from_msg() when copying CAN frame data from userspace. Also move the kt_ival1/kt_ival2/ival1/ival2 updates in bcm_tx_setup() under op->bcm_tx_lock, and read kt_ival1/kt_ival2/count under the same lock in bcm_tx_set_expiry() and bcm_tx_timeout_handler(), closing the torn 64-bit ktime_t read on 32-bit platforms. | ||||
| CVE-2026-72118 | 1 Linux | 1 Linux Kernel | 2026-08-19 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: can: bcm: fix CAN frame rx/tx statistics KCSAN detected a data race within the bcm_rx_handler() when two CAN frames have been simultaneously received and processed in a single rx op by two different CPUs. Use atomic operations with (signed) long data types to access the statistics in the hot path to fix the KCSAN complaint. Additionally simplify the update and check of statistics overflow by using the atomic operations in separate bcm_update_[rx|tx]_stats() functions. The rx variant runs under bcm_rx_update_lock to prevent races when resetting the two rx counters; the tx variant runs under bcm_tx_lock and only needs to guard its own counter's overflow. As the rx path resets its values already at LONG_MAX / 100, there is no conflict between the two locking domains (bcm_rx_update_lock vs. bcm_tx_lock) even for ops that use both paths. The rx statistics update and the frames_filtered update in bcm_rx_changed() were previously performed in two separate bcm_rx_update_lock sections. For an rx op subscribed on all interfaces (ifindex == 0), bcm_rx_handler() can run concurrently on different CPUs, so a counter reset by one CPU between these two sections could leave frames_filtered larger than frames_abs on another CPU, producing a bogus (even negative) reduction percentage in procfs. Update the statistics in the same critical section as bcm_rx_changed() to close this gap, which also removes the now unneeded extra lock/unlock pair around the traffic_flags calculation. | ||||
| CVE-2026-72115 | 1 Linux | 1 Linux Kernel | 2026-08-19 | 8.1 High |
| In the Linux kernel, the following vulnerability has been resolved: can: bcm: track a single source interface for ANYDEV timeout/throttle ops An ANYDEV rx op (ifindex == 0) with an active RX timeout and/or throttle timer has no defined semantics when matching frames arrive from several interfaces: bcm_rx_handler() can run concurrently for the same op on different CPUs, racing hrtimer_cancel()/ bcm_rx_starttimer() against bcm_rx_timeout_handler() and causing spurious RX_TIMEOUT notifications and last_frames corruption. The same concurrency lets throttled multiplex frames from different interfaces clobber the single rx_ifindex/rx_stamp fields shared by the op. Add op->if_detected to track the first interface that delivers a matching frame while a timeout/throttle timer is configured, and reject frames from any other interface for that op. The claim is decided in bcm_rx_handler() before hrtimer_cancel() touches op->timer, so a rejected frame can never disturb the claimed interface's watchdog. RTR-mode ops are excluded via RX_RTR_FRAME, independent of kt_ival1/kt_ival2, since those may briefly hold a stale value from an earlier non-RTR configuration. The claim is released in bcm_notify() on NETDEV_UNREGISTER and in bcm_rx_setup() when SETTIMER reconfigures the timer values. A (re-)claim is only possible on CAN devices in NETREG_REGISTERED dev->reg_state to cover the release in bcm_notify() where reg_state becomes NETREG_UNREGISTERING until synchronize_net(). | ||||
| CVE-2026-74511 | 1 Linux | 1 Linux Kernel | 2026-08-19 | 5.5 Medium |
| This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. | ||||
| CVE-2026-74262 | 1 Linux | 1 Linux Kernel | 2026-08-17 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: kcm: use WRITE_ONCE() when changing lower socket callbacks kcm_attach() replaces a live lower TCP socket's sk_data_ready and sk_write_space callbacks with KCM handlers, and kcm_unattach() restores them later. Those callback-pointer updates are still plain stores even though the same fields can be read and invoked concurrently on other CPUs. If another CPU observes an older callback snapshot after the live field has already been restored, callback execution can run with a mismatched target and sk_user_data state, leading to stale or misdirected wakeups. Use WRITE_ONCE() for the callback replacement and restore operations so these shared callback fields follow the same visibility contract already established by the earlier 4022 fixes. | ||||
| CVE-2026-68469 | 1 Linux | 1 Linux Kernel | 2026-08-17 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: wifi: mwifiex: fix permanently busy scans after multiple roam iterations In order for the firmware to sleep, the driver has to confirm a previously received sleep request. The normal sequence of evets goes like this: EVENT_SLEEP -> adapter->ps_state = PS_STATE_PRE_SLEEP -> sleep-confirm -> SLEEP -> EVENT_AWAKE -> AWAKE. Before sending the sleep-confirm command, the driver must make sure there are no commands either running or waiting to be completed. mwifiex_ret_802_11_associate() unconditionally sets ps_state = PS_STATE_AWAKE when it processes the association command response, outside of the normal powersave management flow. If EVENT_SLEEP arrives while the association command is in flight, ps_state is PRE_SLEEP when the association command response is parsed, and the forced AWAKE overwrites it. The deferred sleep-confirm is never sent. A subsequent scan_start command is correctly acknowledged, but the firmware doesn't generate scan_result events. The scan request never finishes, and additional requests from userspace fail with -EBUSY. After testing on both IW412 and W8997, I could only trigger the bug on the IW412 and observed the firmwares behave differently. On the IW412 the firmware still sends EVENT_SLEEP while the authentication / association process is ongoing. A W8997 under the same conditions seems to suppress power-save for the duration of the association, so PRE_SLEEP never coincided with the association response even after extended periods of testing using the loops described below (>12hours). On the IW412, the delay between commands that triggers an EVENT_SLEEP was empirically determined to be ~20ms. This delay can naturally occur when the driver is outputting debugging information (debug_mask = 0x00000037), in which situation the busy scans issue is repeatable while running "test 1)" as described below. If the delay between commands is less than ~20ms, the firmware stays awake and the issue was not reproducible running the same test. The host_mlme=false path also behaves differently. In this case, the entire authentication / association transaction is executed by one command (HostCmd_CMD_802_11_ASSOCIATE), and the firmware doesn't emit EVENT_SLEEP while the command is running. Remove the assignment so the ps_state is only manipulated in the paths that are related to powersave event handling and on the main workqueue for correct sleep confirmation. The following loop tests were performed (with debugging output enabled): 1) force roaming between two AP's, one 5GHz and one 2.4GHz, same SSID. Use wpa_cli to trigger the roaming behavior, sleep 2s between iterations. 2) force a disconnection to AP 1 and a connection to AP 2, test scan. Use wpa_cli to trigger the connection changes, sleep 2s between iterations. Each test ran in each device for at least 3 hours. | ||||
| CVE-2026-68456 | 1 Linux | 1 Linux Kernel | 2026-08-17 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: usb: atm: ueagle-atm: wait for pre-firmware load in .disconnect() ueagle-atm uses the asynchronous request_firmware_nowait() in .probe(), but does not wait for its completion, not even in .disconnect(); so, if the device is unplugged meanwhile, its teardown runs concurrently with that. Even though this inconsistency is worth addressing on its own, it has also triggered several bug reports in syzbot over the years (some auto-closed) where the firmware sysfs fallback mechanism (CONFIG_FW_LOADER_USER_HELPER) creates a firmware subdirectory in the device directory during its removal, which might hit unexpected conditions in kernfs, apparently, depending at which point the add and remove operations raced. (See links.) The pattern is: usb ?-?: Direct firmware load for ueagle-atm/eagle?.fw failed with error -2 usb ?-?: Falling back to sysfs fallback for: ueagle-atm/eagle?.fw <ERROR> Call trace: ... kernfs_create_dir_ns sysfs_create_dir_ns create_dir kobject_add_internal kobject_add_varg kobject_add class_dir_create_and_add get_device_parent device_add fw_load_sysfs_fallback fw_load_from_user_helper firmware_fallback_sysfs _request_firmware request_firmware_work_func ... (Some variations are observed, after fw_load_sysfs_fallback(), e.g., [1].) While the kernfs side is being looked at, the ueagle-atm side can be fixed by waiting for the pre-firmware load in the .disconnect() handler. This change has a similar approach to previous work by Andrey Tsygunka [2] (wait_for_completion() in .disconnect()), but it is relatively different in design/implementation; using the Originally-by tag for credit assignment. This has been tested with: - synthetic reproducer to check the error path; - USB gadget (virtual device) to check the firmware upload path; - QEMU device emulator to check the device ID re-enumeration path; (The latter two were written by Claude; no other code/text in this commit.) Links (year first reported): 2025 https://syzbot.org/bug?extid=ce1e5a1b4e086b43e56d 2025 https://syzbot.org/bug?extid=9af8471255ac36e34fd4 2024 https://syzbot.org/bug?extid=306212936b13e520679d 2023 https://syzkaller.appspot.com/bug?extid=457452d30bcdda75ead2 2022 https://syzbot.org/bug?extid=782984d6f1701b526edb 2021 https://syzbot.org/bug?id=f3f221579f4ef7e9691281f3c6f56c05f83e8490 2021 https://syzbot.org/bug?id=84d86f0d71394829df6fc53daf6642c045983881 2021 https://syzbot.org/bug?id=3302dc1c0e2b9c94f2e8edb404eabc9267bc6f90 [1] https://syzkaller.appspot.com/bug?extid=457452d30bcdda75ead2 [2] https://lore.kernel.org/lkml/20250410093146.3776801-2-aitsygunka@yandex.ru/ | ||||
| CVE-2026-68334 | 1 Linux | 1 Linux Kernel | 2026-08-13 | 5.9 Medium |
| In the Linux kernel, the following vulnerability has been resolved: rxrpc: fix io_thread race in rxrpc_wake_up_io_thread() rxrpc_wake_up_io_thread() checks local->io_thread before waking it, but then reloads the pointer for wake_up_process(). local->io_thread is cleared with WRITE_ONCE() when the I/O thread exits, so the second load can see NULL even if the first load did not. Take a READ_ONCE() snapshot and use it for both the NULL check and the wake_up_process() call, as rxrpc_encap_rcv() already does. | ||||
| CVE-2026-68396 | 1 Linux | 1 Linux Kernel | 2026-08-11 | 5.5 Medium |
| In the Linux kernel, the following vulnerability has been resolved: scsi: core: wake eh reliably when using scsi_schedule_eh Drivers which use the scsi_schedule_eh function to run the error handler currently risk the error handler thread never waking once all commands are timed out or inactive. There is no enforced memory order between setting the host into error recovery state and counting busy commands. This can result in a race with scsi_dec_host_busy where neither CPU sees both conditions of all commands inactive and the host error state to request waking the error handler. To fix this, run the scsi_schedule_eh's scsi_eh_wakeup from a new work item which will use rcu to ensure scsi_schedule_eh's call to scsi_host_busy will occur after the error state is globally visible and will be seen by any current scsi_dec_host_busy callers. | ||||
| CVE-2024-47690 | 1 Linux | 1 Linux Kernel | 2026-08-04 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: f2fs: get rid of online repaire on corrupted directory syzbot reports a f2fs bug as below: kernel BUG at fs/f2fs/inode.c:896! RIP: 0010:f2fs_evict_inode+0x1598/0x15c0 fs/f2fs/inode.c:896 Call Trace: evict+0x532/0x950 fs/inode.c:704 dispose_list fs/inode.c:747 [inline] evict_inodes+0x5f9/0x690 fs/inode.c:797 generic_shutdown_super+0x9d/0x2d0 fs/super.c:627 kill_block_super+0x44/0x90 fs/super.c:1696 kill_f2fs_super+0x344/0x690 fs/f2fs/super.c:4898 deactivate_locked_super+0xc4/0x130 fs/super.c:473 cleanup_mnt+0x41f/0x4b0 fs/namespace.c:1373 task_work_run+0x24f/0x310 kernel/task_work.c:228 ptrace_notify+0x2d2/0x380 kernel/signal.c:2402 ptrace_report_syscall include/linux/ptrace.h:415 [inline] ptrace_report_syscall_exit include/linux/ptrace.h:477 [inline] syscall_exit_work+0xc6/0x190 kernel/entry/common.c:173 syscall_exit_to_user_mode_prepare kernel/entry/common.c:200 [inline] __syscall_exit_to_user_mode_work kernel/entry/common.c:205 [inline] syscall_exit_to_user_mode+0x279/0x370 kernel/entry/common.c:218 do_syscall_64+0x100/0x230 arch/x86/entry/common.c:89 entry_SYSCALL_64_after_hwframe+0x77/0x7f RIP: 0010:f2fs_evict_inode+0x1598/0x15c0 fs/f2fs/inode.c:896 Online repaire on corrupted directory in f2fs_lookup() can generate dirty data/meta while racing w/ readonly remount, it may leave dirty inode after filesystem becomes readonly, however, checkpoint() will skips flushing dirty inode in a state of readonly mode, result in above panic. Let's get rid of online repaire in f2fs_lookup(), and leave the work to fsck.f2fs. | ||||
| CVE-2026-64468 | 1 Linux | 1 Linux Kernel | 2026-08-02 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: binder: fix UAF in binder_free_transaction() In binder_free_transaction(), the t->to_proc is read under the t->lock. However, once the t->lock is dropped, the to_proc can die in parallel. This leads to a use-after-free error when we attempt to acquire its inner lock right afterwards: ================================================================== BUG: KASAN: slab-use-after-free in _raw_spin_lock+0xe4/0x1a0 Write of size 4 at addr ffff00001125da70 by task B/672 CPU: 20 UID: 0 PID: 672 Comm: B Not tainted 7.1.0-rc6-00284-g8e65320d91cd #4 PREEMPT Hardware name: linux,dummy-virt (DT) Call trace: _raw_spin_lock+0xe4/0x1a0 binder_free_transaction+0x8c/0x320 binder_send_failed_reply+0x21c/0x2f8 binder_thread_release+0x488/0x7e0 binder_ioctl+0x12c0/0x29a0 [...] Allocated by task 675: __kmalloc_cache_noprof+0x174/0x444 binder_open+0x118/0xb70 do_dentry_open+0x374/0x1040 vfs_open+0x58/0x3bc [...] Freed by task 212: __kasan_slab_free+0x58/0x80 kfree+0x1a0/0x4a4 binder_proc_dec_tmpref+0x32c/0x5e0 binder_deferred_func+0xc48/0x104c process_one_work+0x53c/0xbc0 [...] ================================================================== To prevent this, pin the target thread (t->to_thread) to guarantee the target process remains alive. Undelivered transactions without a target thread are already safe, as the target process can only be the current context in those paths. | ||||
| CVE-2026-17979 | 1 Google | 1 Chrome | 2026-07-31 | 7.5 High |
| Race in V8 in Google Chrome prior to 151.0.7922.72 allowed a remote attacker to execute arbitrary code inside a sandbox via a crafted HTML page. (Chromium security severity: Low) | ||||
| CVE-2025-38617 | 2 Debian, Linux | 2 Debian Linux, Linux Kernel | 2026-07-30 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: net/packet: fix a race in packet_set_ring() and packet_notifier() When packet_set_ring() releases po->bind_lock, another thread can run packet_notifier() and process an NETDEV_UP event. This race and the fix are both similar to that of commit 15fe076edea7 ("net/packet: fix a race in packet_bind() and packet_notifier()"). There too the packet_notifier NETDEV_UP event managed to run while a po->bind_lock critical section had to be temporarily released. And the fix was similarly to temporarily set po->num to zero to keep the socket unhooked until the lock is retaken. The po->bind_lock in packet_set_ring and packet_notifier precede the introduction of git history. | ||||
| CVE-2025-38083 | 2 Debian, Linux | 2 Debian Linux, Linux Kernel | 2026-07-30 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: net_sched: prio: fix a race in prio_tune() Gerrard Tai reported a race condition in PRIO, whenever SFQ perturb timer fires at the wrong time. The race is as follows: CPU 0 CPU 1 [1]: lock root [2]: qdisc_tree_flush_backlog() [3]: unlock root | | [5]: lock root | [6]: rehash | [7]: qdisc_tree_reduce_backlog() | [4]: qdisc_put() This can be abused to underflow a parent's qlen. Calling qdisc_purge_queue() instead of qdisc_tree_flush_backlog() should fix the race, because all packets will be purged from the qdisc before releasing the lock. | ||||
| CVE-2025-23151 | 2 Debian, Linux | 2 Debian Linux, Linux Kernel | 2026-07-30 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: bus: mhi: host: Fix race between unprepare and queue_buf A client driver may use mhi_unprepare_from_transfer() to quiesce incoming data during the client driver's tear down. The client driver might also be processing data at the same time, resulting in a call to mhi_queue_buf() which will invoke mhi_gen_tre(). If mhi_gen_tre() runs after mhi_unprepare_from_transfer() has torn down the channel, a panic will occur due to an invalid dereference leading to a page fault. This occurs because mhi_gen_tre() does not verify the channel state after locking it. Fix this by having mhi_gen_tre() confirm the channel state is valid, or return error to avoid accessing deinitialized data. [mani: added stable tag] | ||||
| CVE-2026-63885 | 1 Linux | 1 Linux Kernel | 2026-07-26 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: drm/gem: fix race between change_handle and handle_delete drm_gem_change_handle_ioctl leaves the old handle live in the IDR during the window between spin_unlock(table_lock) and the final spin_lock(table_lock). A concurrent drm_gem_handle_delete on the old handle succeeds in this window, decrements handle_count to 0, and frees the GEM object while the new handle's IDR entry still references it. NULL the old handle's IDR entry before dropping table_lock so that any concurrent GEM_CLOSE on the old handle sees NULL and returns -EINVAL. Restore the old entry on the prime-bookkeeping error path. | ||||
| CVE-2026-63974 | 1 Linux | 1 Linux Kernel | 2026-07-26 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: Bluetooth: hci_sync: Set HCI_CMD_DRAIN_WORKQUEUE during device close Since hci_dev_close_sync() can now be called during the reset path, we should also set HCI_CMD_DRAIN_WORKQUEUE. This avoids queuing timeouts while the hdev workqueue is being drained. | ||||
| CVE-2026-63894 | 1 Linux | 1 Linux Kernel | 2026-07-21 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: usb: gadget: f_fs: serialize DMABUF cancel against request completion ffs_epfile_dmabuf_io_complete() calls usb_ep_free_request() on the completed request but leaves priv->req, the back-pointer that ffs_dmabuf_transfer() set on submission, pointing at the freed memory. A later FUNCTIONFS_DMABUF_DETACH ioctl or ffs_epfile_release() on the close path still sees priv->req non-NULL under ffs->eps_lock: if (priv->ep && priv->req) usb_ep_dequeue(priv->ep, priv->req); so usb_ep_dequeue() is called on a freed usb_request. On dummy_hcd the dequeue path only walks a live queue and pointer-compares, so the freed pointer reads without faulting and KASAN requires an explicit check at the FunctionFS call site to surface the use-after-free. On SG-capable in-tree UDCs the dequeue path dereferences the supplied request immediately: * chipidea's ep_dequeue() does container_of(req, struct ci_hw_req, req) and reads hwreq->req.status before acquiring its own lock. * cdnsp's cdnsp_gadget_ep_dequeue() reads request->status first. The narrower option of clearing priv->req via cmpxchg() in the completion does not close the race: the completion runs without eps_lock, so a cancel path holding eps_lock can still observe priv->req non-NULL, race a concurrent completion that clears and frees, and pass the freed pointer to usb_ep_dequeue(). A slightly longer fix that moves the free into the cleanup work is needed. Same class of lifetime race as the recent usbip-vudc timer fix [1]. Take eps_lock in the sole place that mutates priv->req from the callback direction by moving usb_ep_free_request() out of the completion into ffs_dmabuf_cleanup(), the existing work handler scheduled by ffs_dmabuf_signal_done() on ffs->io_completion_wq. Clear priv->req there under eps_lock before freeing, and only clear if priv->req still names our request (a subsequent ffs_dmabuf_transfer() on the same attachment may have queued a new one). This keeps the existing dummy_hcd sync-dequeue invariant: the completion callback is still invoked by the UDC without eps_lock held (dummy_hcd drops its own lock before calling the callback), and the callback now takes no f_fs lock at all. Serialization against the cancel path happens in cleanup, which runs from the workqueue with no f_fs lock held on entry. The priv ref count protects the containing ffs_dmabuf_priv: ffs_dmabuf_transfer() takes a ref via ffs_dmabuf_get(), cleanup drops it via ffs_dmabuf_put(), so priv stays live for the cleanup even after the cancel path's list_del + ffs_dmabuf_put. The ffs_dmabuf_transfer() error path no longer frees usb_req inline: fence->req and fence->ep are set before usb_ep_queue(), so ffs_dmabuf_cleanup() (scheduled by the error-path ffs_dmabuf_signal_done()) owns the free regardless of whether the queue succeeded. Reproduced under KASAN on both detach and close paths against dummy_hcd with an observability hook (kasan_check_byte(priv->req) immediately before usb_ep_dequeue) at the two FunctionFS cancel sites to surface the stale-pointer access; the hook is not part of this patch. The KASAN allocator / free stacks in the captured splats identify the same request: alloc in dummy_alloc_request, free in dummy_timer, fault reached from ffs_epfile_release (close) and from the FUNCTIONFS_DMABUF_DETACH ioctl (detach). With the patch applied, both paths are silent under the same hook. The bug is reached from the FunctionFS device node, which in real deployments is owned by the privileged gadget daemon (adbd, UMS, composite gadget services, etc.); it is not reachable from unprivileged userspace or from a USB host on the cable. FunctionFS mounts default to GLOBAL_ROOT_UID, but the filesystem supports uid=, gid=, and fmode= delegation to a non-root gadget daemon, so on real deployments the attacker may be a less-privileged service rather than root. | ||||
| CVE-2026-53357 | 1 Linux | 1 Linux Kernel | 2026-07-18 | 8 High |
| In the Linux kernel, the following vulnerability has been resolved: Bluetooth: fix UAF in l2cap_sock_cleanup_listen() vs l2cap_conn_del() bt_accept_dequeue() unlinks a not-yet-accepted child from the parent accept queue and release_sock()s it before returning, so the returned sk has no caller reference and is unlocked. l2cap_sock_cleanup_listen() walks these children on listening-socket close. A concurrent HCI disconnect drives hci_rx_work -> l2cap_conn_del() which runs l2cap_chan_del() + l2cap_sock_kill() and frees the child sk and its l2cap_chan; cleanup_listen() then uses both: BUG: KASAN: slab-use-after-free in l2cap_sock_kill l2cap_sock_kill / l2cap_sock_cleanup_listen / __x64_sys_close Freed by: l2cap_conn_del -> l2cap_sock_close_cb -> l2cap_sock_kill This is distinct from the two fixes already in this area: commit e83f5e24da741 ("Bluetooth: serialize accept_q access") serialises the accept_q list/poll and takes temporary refs inside bt_accept_dequeue(), and CVE-2025-39860 serialises the userspace close()/accept() race by calling cleanup_listen() under lock_sock() in l2cap_sock_release(). Neither covers l2cap_conn_del() running from hci_rx_work, so this UAF still reproduces on current bluetooth/master. Take the reference at the source: bt_accept_dequeue() does sock_hold() while sk is still locked, before release_sock(); callers sock_put(). cleanup_listen() pins the chan with l2cap_chan_hold_unless_zero() under a brief child sk lock (serialising vs l2cap_sock_teardown_cb()), drops it before l2cap_chan_lock(), and skips a duplicate l2cap_sock_kill() on SOCK_DEAD. conn->lock is not taken here: cleanup_listen() runs under the parent sk lock and that would invert conn->lock -> chan->lock -> sk_lock (lockdep). KASAN/SMP: an unprivileged listen/close vs HCI-disconnect race produced 12 use-after-free reports per run before this change; 0, and no lockdep report, over 1600+ raced iterations after it on bluetooth/master. | ||||