In multiple functions of face_status.h, there is a possible way to modify verified biometric enrollment data in shared memory due to a race condition. This could lead to local escalation of privilege with System execution privileges needed. User interaction is not needed for exploitation.

NocoDB before 2026.08.1 Password Reset Token Race Condition

NocoDB before 2026.08.1 contains a race condition vulnerability in users.service.ts that allows holders of a valid reset token to perform multiple password changes by sending concurrent reset requests. Attackers can exploit the window created by slow bcrypt hashing before the token is cleared to overwrite the owner's new password and lock them out.

NocoDB before 2026.08.0 Refresh Token Reuse via Non-Atomic Rotation

NocoDB before 2026.08.0 contains a race condition in refresh-token rotation that allows attackers to reuse tokens because UserRefreshToken.ts never checks the affected-row count. Attackers holding a captured refresh token can present it concurrently with the legitimate user to obtain a valid authenticated session, and no reuse event is recorded.

NocoDB before 2026.06.2 OAuth Refresh Token Rotation Race Condition

NocoDB before 2026.06.2 contains a race condition vulnerability in oauth-token.service.ts that allows attackers to reuse a refresh token by presenting it concurrently during non-atomic rotation. Attackers holding a captured refresh token can race the legitimate client to obtain their own access and refresh tokens, retaining scoped access without triggering reuse detection.

OpenMage magento-lts before 20.19.0 Race Condition in Coupon Usage Limits

OpenMage magento-lts before 20.19.0 and 21.0.0-beta1 before 21.0.0-beta3 contains a race condition in shopping cart price rule usage limits, because Mage_SalesRule_Model_Validator checks coupon limits without locking and the usage counters are later incremented non-atomically. Unauthenticated attackers, including guest shoppers, can submit concurrent checkouts to redeem a limited coupon more times than its cap allows.

Paaster: TOCTOU race condition defeats the 'burn after reading' guarantee on view-once pastes

Paaster is a pastebin application. Prior to version 3.3.0, Paaster's "view once" (burn-after-reading) paste mode can be bypassed with concurrent requests. The check that's supposed to enforce single-use is a plain read followed by a separate write, with no atomicity, so multiple simultaneous requests can all see the paste as "not yet read" and all successfully retrieve it. This issue has been patched in version 3.3.0.

Improper access control within the AMD Secure Encrypted Virtualization (SEV) firmware could allow an attacker with administrative privileges to tamper with memory, potentially resulting in loss of guest memory integrity.

In handle_chan_msg of tipc_virtio_dev.c, there is a possible way to bypass memory tag access controls via concurrent shared memory modification due to a race condition. This could lead to local escalation of privilege with System execution privileges needed. User interaction is not needed for exploitation.

In multiple locations, there is a possible way to modify authenticated coprocessor firmware in shared memory before loading due to a race condition. This could lead to local escalation of privilege with System execution privileges needed. User interaction is not needed for exploitation.

Apache HTTP Server: mod_http2: heap corruption and RCE in assign_headers

Concurrent Execution using Shared Resource with Improper Synchronization vulnerability in Apache HTTP Server's mod_http2 in assign_headers() can lead to RCE. This issue affects Apache HTTP Server: from 2.4.55 through 2.4.70. Affected releases of mod_h2 from GitHub: from 2.0.8 through 2.0.42.

iio: event: Fix event FIFO reset race

In the Linux kernel, the following vulnerability has been resolved: iio: event: Fix event FIFO reset race `iio_event_getfd()` creates the event file descriptor with `anon_inode_getfd()`, which allocates a new fd, creates the anonymous file and installs it in the process fd table before returning to the caller. The IIO code resets the event FIFO after `anon_inode_getfd()` has returned, but before `IIO_GET_EVENT_FD_IOCTL` has copied the fd number to userspace. But since fd tables are shared between threads, another thread can guess the newly allocated fd number and issue a `read()` on it as soon as the fd has been installed. This means the `kfifo_to_user()` in `iio_event_chrdev_read()` can run in parallel with the `kfifo_reset_out()` in `iio_event_getfd()`. The kfifo documentation says that `kfifo_reset_out()` is only safe when it is called from the reader thread and there is only one concurrent reader. Otherwise it is dangerous and must be handled in the same way as `kfifo_reset()`. If that happens, `kfifo_to_user()` can advance the FIFO `out` index based on state from before the reset, after the reset has already moved the `out` index to the current `in` index. That can leave the FIFO with an `out` index past the `in` index. A later `read()` can then see an underflowed FIFO length and copy more data than the event FIFO buffer contains. This can result in an out-of-bounds read and leak adjacent kernel memory to userspace. Move the FIFO reset before `anon_inode_getfd()`. At that point the event fd is marked busy, but the new fd has not been installed yet, so userspace cannot access it while the FIFO is reset.

YITH WooCommerce Gift Cards < 4.38.1 - Unauthenticated Gift Card Balance Double-Spending via Race Condition

The YITH WooCommerce Gift Cards WordPress plugin before 4.38.1 does not lock or atomically update a gift card's balance when it is redeemed at checkout, allowing an attacker who holds a gift card code to spend more than its funded value by submitting multiple checkouts for the same code at the same time.

Microsoft Trace Data Helper Elevation of Privilege Vulnerability

Use after free in Microsoft Trace Data Helper allows an authorized attacker to elevate privileges locally.

ClassFactory Race Condition and Retained Assembly Memory in Telerik UI for ASP.NET MVC

In affected versions of Progress® Telerik® UI for ASP.NET MVC `2012.2.710` through `2026.3.811`, ClassFactory updates a shared class dictionary without exclusive write protection and emits non-collectible dynamic assemblies that remain loaded for the AppDomain's lifetime. The dictionary lookup and insertion are not atomic, and case variations in aggregate descriptors can produce distinct retained types even though member resolution is case-insensitive. An unauthenticated remote attacker can exploit this if the application exposes an aggregation endpoint that is reachable without authentication, by submitting concurrent or repeated crafted requests. These requests may corrupt dictionary state or increase CPU and memory use, potentially degrading availability. The issue is fixed in version `2026.3.1015`.

serial: qcom_geni: fix kfifo underflow when flush precedes DMA completion IRQ

In the Linux kernel, the following vulnerability has been resolved: serial: qcom_geni: fix kfifo underflow when flush precedes DMA completion IRQ When uart_flush_buffer() runs before the DMA completion IRQ is delivered, the following race can occur (all steps serialized by uart_port_lock): 1. DMA starts: tx_remaining = N, kfifo contains N bytes 2. DMA completes in hardware; IRQ is pending but not yet delivered 3. uart_flush_buffer() acquires the port lock and calls kfifo_reset(), making kfifo_len() = 0 while tx_remaining remains N 4. uart_flush_buffer() releases the port lock 5. DMA IRQ fires; handle_tx_dma() acquires the port lock and calls uart_xmit_advance(uport, tx_remaining) on an empty kfifo uart_xmit_advance() increments kfifo->out by tx_remaining. Since kfifo_reset() already set both in and out to 0, out wraps past in, causing kfifo_len() to return UART_XMIT_SIZE - tx_remaining. The next start_tx_dma() call then submits a DMA transfer of stale buffer data. Fix this by snapshotting kfifo_len() at the start of handle_tx_dma() and skipping uart_xmit_advance() when fifo_len < tx_remaining, which indicates the kfifo was reset by a preceding flush.

In multiple locations, there is a possible use-after-free due to a race condition. This could lead to local escalation of privilege with System execution privileges needed. User interaction is not needed for exploitation.

Windows Win32k Elevation of Privilege Vulnerability

Use after free in Windows Win32K allows an authorized attacker to elevate privileges locally.

net/handshake: Use spin_lock_bh for hn_lock

In the Linux kernel, the following vulnerability has been resolved: net/handshake: Use spin_lock_bh for hn_lock nvmet_tcp_state_change(), a socket callback that runs in BH context, can reach handshake_req_cancel() via nvmet_tcp_schedule_release_queue() and tls_handshake_cancel(). handshake_req_cancel() acquires hn->hn_lock with plain spin_lock(). If a process-context thread on the same CPU holds hn->hn_lock when a softirq invokes the cancel path, the lock attempt deadlocks. This is the only caller that invokes tls_handshake_cancel() from BH context; every other consumer calls it from process context. Deferring the cancel to process context in the NVMe target is not straightforward: nvmet_tcp_schedule_release_queue() must call tls_handshake_cancel() atomically with its state transition to DISCONNECTING. If the cancel were deferred, the handshake completion callback could fire in the window before the cancel runs, observe the unexpected state, and return without dropping its kref on the queue. Reworking that interlock is considerably more invasive than hardening the handshake lock. Convert all hn->hn_lock acquisitions from spin_lock/spin_unlock to spin_lock_bh/spin_unlock_bh so the lock is never taken with softirqs enabled.

ALSA: usb-audio: avoid kobject path lookup in DualSense match

In the Linux kernel, the following vulnerability has been resolved: ALSA: usb-audio: avoid kobject path lookup in DualSense match The DualSense jack-detection input handler verifies that a matching input device belongs to the same physical controller by building kobject path strings for both the input device and the USB audio device, then comparing the path prefix. This was observed when a weak physical connection caused the controller to rapidly disconnect and reconnect. During that repeated hotplug, snd_dualsense_ih_match() can run while the controller's USB device is being disconnected. kobject_get_path() walks ancestor kobjects and dereferences their names; if the USB device kobject name is no longer valid, this can fault in strlen(): RIP: 0010:strlen+0x10/0x30 Call Trace: kobject_get_path+0x34/0x150 snd_dualsense_ih_match+0x49/0xd0 [snd_usb_audio] input_register_device+0x566/0x6a0 ps_probe+0xb89/0x1590 [hid_playstation] The same ownership check can be done without building kobject path strings. The input device is parented below the HID device, USB interface and USB device, so walking the input device parent chain and comparing against the mixer USB device preserves the check without dereferencing kobject names during disconnect.

net/handshake: Drain pending requests at net namespace exit

In the Linux kernel, the following vulnerability has been resolved: net/handshake: Drain pending requests at net namespace exit The arguments to list_splice_init() in handshake_net_exit() are reversed. The call moves the local empty "requests" list onto hn->hn_requests, leaving the local list empty, so the subsequent drain loop runs zero iterations. Pending handshake requests that had not yet been accepted are not torn down when the net namespace is destroyed; each one keeps a reference on a socket file and on the handshake_req allocation. Pass the source and destination in the documented order (list_splice_init(list, head) moves list onto head) so the pending list is transferred to the local scratch list and drained through handshake_complete(). Fixing the splice direction exposes a list-corruption race. After the splice each req->hr_list still has non-empty link pointers, threading the stack-local scratch list rather than hn_requests. A concurrent handshake_req_cancel() -- for example, from sunrpc's TLS timeout on a kernel socket whose netns reference was not taken -- finds the request through the rhashtable, calls remove_pending(), and sees !list_empty(&req->hr_list). __remove_pending_locked() then list_del_init()s an entry off the scratch list while the drain iterates, corrupting it. The same call arriving after the drain loop has run list_del() on an entry hits LIST_POISON instead. Have remove_pending() check HANDSHAKE_F_NET_DRAINING under hn_lock and report not-found when drain is in progress. The drain has already taken ownership; handshake_complete()'s existing test_and_set on HANDSHAKE_F_REQ_COMPLETED still arbitrates between drain and cancel for who calls the consumer's hp_done. Use list_del_init() rather than list_del() in the drain so req->hr_list does not carry LIST_POISON after drain releases the entry. The DRAINING guard in remove_pending() makes cancel return false, but cancel still falls through to test_and_set_bit on HANDSHAKE_F_REQ_COMPLETED and drops the request's hr_file reference. Without another pin, if that is the last reference, sk_destruct frees the request while it is still linked on the drain loop's local list. Pin each request's hr_file under hn_lock before releasing the list, and drop that drain pin after the loop finishes with the request.