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Search Results (394922 CVEs found)
| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-90343 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: wifi: cfg80211: stop PMSR before P2P and NAN teardown PMSR request teardown must abort active measurements while the wireless_dev is still present in the driver. cfg80211_leave_locked() and cfg80211_stop_pd() already do this before invoking the driver's stop callback, but cfg80211_stop_p2p_device() and cfg80211_stop_nan() do not. Those helpers are also called directly by nl80211, rfkill shutdown, and wireless_dev unregister paths. If one of these paths stops a P2P device or NAN interface with a pending request, it removes the mac80211 subinterface from the driver first. Subsequent request cleanup cannot reach the lower driver's abort callback, but cfg80211 frees the request regardless. Driver state can then retain a stale request and use it when it later reports a result. Call cfg80211_pmsr_wdev_down() before stopping the P2P device or NAN interface. This keeps lower-driver request state and cfg80211 request ownership in sync for all of the helpers' callers. | ||||
| CVE-2026-90342 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: bpf: Fix mmap_lock deadlock on arena lock failure Reported by the Sashiko AI review. arena_vm_fault() returns VM_FAULT_RETRY when it can't take arena->spinlock, but it never took mmap_lock. The fault path assumes a VM_FAULT_RETRY handler already dropped mmap_lock and re-takes it on the retry, so mmap_lock gets taken twice and can deadlock: do_user_addr_fault() { fault = handle_mm_fault(...); // calls arena_vm_fault() if (fault & VM_FAULT_RETRY) goto retry; // re-locks mmap_lock mmap_read_unlock(mm); } Return VM_FAULT_SIGBUS instead, for two reasons: 1. We could keep VM_FAULT_RETRY, but then we'd have to drop the fault lock first and cap the retry ourselves, the way __folio_lock_or_retry() does. 2. A failed raw_res_spin_lock_irqsave() already means a possible deadlock was detected, so retrying just hits the same lock again. So returning VM_FAULT_RETRY here is overkill. | ||||
| CVE-2026-90341 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: firmware: coreboot: Validate table bounds The existing coreboot_table_populate() bounds checks limit individual entries to the mapped length. However, coreboot_table_probe() replaces the platform resource length with header and table sizes supplied by firmware before mapping the full table. A malformed table can overflow the 32-bit size addition or advertise an extent beyond the resource, causing the driver to map and parse memory outside the resource. A resource shorter than the fixed header is also mapped as though it contained a complete header. Reject resources shorter than the fixed header. After validating the signature, require a complete header, calculate the advertised extent with overflow checking, and reject extents beyond the resource before remapping the table. | ||||
| CVE-2026-90340 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: pinctrl: generic: free maps on pinctrl_generic_to_map() failure pinctrl_generic_to_map() parses DT configuration and allocates pinctrl maps via pinctrl_utils_reserve_map(). If subsequent steps (such as pinctrl_utils_add_map_mux(), pinctrl_generic_add_group(), pinconf_generic_parse_dt_config(), or pinctrl_utils_add_map_configs()) return an error, *maps may contain partially allocated map entries. Returning the error directly without freeing *maps leaks the allocated mapping memory across all drivers that rely on pinctrl_generic_to_map(). Fix this by calling pinctrl_utils_free_map() and resetting *maps, *num_maps, and *num_reserved_maps in the error path of pinctrl_generic_to_map(). | ||||
| CVE-2026-90339 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: powerpc/syscall: Fix syscall skip handling for seccomp and ptrace After enabling GENERIC_ENTRY on PowerPC, syscall_enter_from_user_mode() returns -1 as a sentinel to signal that seccomp or ptrace has intercepted the syscall and already set a return value via syscall_set_return_value(). system_call_exception() was not handling this sentinel, and since -1UL is >= NR_syscalls, the code fell into the out-of-range path and returned -ENOSYS, overwriting the errno already placed in regs->gpr[3]. The naive fix of checking r0 == -1L before the NR_syscalls bounds check is ambiguous: a user legitimately calling syscall(-1) also produces r0 == -1L, and a tracer intercepting such a call would have its injected return value silently discarded. Fix this by introducing a thread flag that is set whenever syscall_set_return_value() explicitly updates the return value. In system_call_exception(), check and clear this flag before dispatching the syscall, and return the preset value directly when it is present. This ensures that an explicitly supplied return value always suppresses syscall execution, regardless of the syscall number. This handles all seccomp actions correctly: - SECCOMP_RET_ERRNO, SECCOMP_RET_TRACE (no tracer), SECCOMP_RET_USER_NOTIF: all call syscall_set_return_value(), flag is set, injected value returned. - SECCOMP_RET_TRAP, SECCOMP_RET_KILL: call syscall_rollback() and deliver a signal; flag is not set, but the process is dying so the return value is irrelevant. The fix covers both ppc32 and ppc64 with no #ifdefs. | ||||
| CVE-2026-90338 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: serial: amba-pl011: keep console clock enabled for atomic writes pl011_console_write_atomic() runs from nbcon atomic context, where sleeping is not allowed. It calls clk_enable(), which takes the common-clk enable_lock. Under PREEMPT_RT that is a sleeping lock: clk_enable_lock() first tries spin_trylock_irqsave(), but on contention falls back to spin_lock_irqsave(). Therefore, an atomic-context printk on an RT kernel with a clk-backed pl011 can trip: BUG: sleeping function called from invalid context at spinlock_rt.c:48 __might_resched from rt_spin_lock rt_spin_lock from clk_enable_lock clk_enable_lock from clk_enable clk_enable from pl011_console_write_atomic ... from vprintk_emit This was found and reproduced on PREEMPT_RT. Arm32 and arm64 DT SoCs are affected; arm64 SBSA/ACPI has no clk, so clk_enable(NULL) short-circuits before the lock. In addition, write_atomic() may be invoked from NMI context and is documented to avoid locking. Removing clk_enable() from the callback also avoids a potentially unsafe NMI acquisition of the common-clock enable_lock. An nbcon atomic-capable console must be printable from any context, so the clock cannot be gated between writes. Enable the clock while the console is available for output: use clk_prepare_enable() in pl011_console_setup(), release it via clk_disable_unprepare() in the console .exit() callback, and drop the per-write clk_enable()/clk_disable() pairs from write_atomic() and write_thread(). When printk suspends consoles, drop the reference after uart_suspend_port() stops console access and restore it before uart_resume_port() -- but only if suspend actually marked the port suspended (a wake-capable tty stays running and must keep its clock), and keep it when console_suspend_enabled is false so no_console_suspend works. The active power cost of keeping the clock enabled is platform-dependent: none where the UART clock is a fixed always-on oscillator, real where it is a gateable clock branch, which then cannot be gated (nor possibly can its parent clocks) while the console is available for output. When serial core actually suspends the port, the reference is released so the clock provider can gate the clock tree. | ||||
| CVE-2026-90337 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: serial: core: do fallible allocations before the console can be registered serial_core_add_one_port() allocates uport->tty_groups after uart_configure_port(), which may register the console. If the allocation fails, the driver unwinds the port while its console remains registered. The earlier uport->name allocation has a related failure path that leaves state->uart_port linked to a port being freed. Failslab reproduced a NULL dereference in PL011 console output and a KASAN use-after-free in i.MX console output after failed binds. Allocate the name and tty_groups before linking the port and configuring it. Reserve space for the optional driver attribute group because config_port() may populate uport->attr_group during configuration. | ||||
| CVE-2026-90336 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: serial: core: clear freed pointers on uart_register_driver() failure uart_register_driver() leaves drv->state pointing to freed memory when tty_alloc_driver() fails. If tty_register_driver() fails, drv->tty_driver also retains a pointer after its reference is dropped. Drivers that use drv->state as an "already registered" flag can then skip registration on the next probe and pass the freed state to uart_add_one_port(). This issue was found with failslab on QEMU's raspi1ap board by failing registration and binding the PL011 port again. Clear both pointers on their failure paths, as uart_unregister_driver() already does. | ||||
| CVE-2026-90335 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: tty: skip cdev_del() when no cdev is registered TTY device registration can fail before a cdev is allocated. Serial core keeps the port so setserial can still use it, and later removal passes the NULL cdev slot to cdev_del(), causing a NULL-pointer dereference. Only delete the cdev when the slot is not NULL. | ||||
| CVE-2026-90334 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: tty: clear cdev pointer after cdev_add() failure tty_cdev_add() drops the cdev reference when cdev_add() fails, but leaves driver->cdevs[index] pointing to freed memory. tty_unregister_device() later passes that stale pointer to cdev_del(), causing a use-after-free. Clear the slot after dropping the reference. | ||||
| CVE-2026-90333 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: dm-integrity: replace forgeable discard filler with a keyed sector marker The discard-block check in dm_integrity_rw_tag() treats a stored tag of all 0xf6 bytes (DISCARD_FILLER) as proof a block was discarded and skips HMAC verification. allow_discards is only accepted in dm-integrity's standalone mode. An attacker with raw write access to the backing device, but without the integrity key, can stamp any block with an all-0xf6 tag and have it served as authentic. Add a new "allow_discards_keyed" target argument that marks discarded blocks with a keyed checksum of (salt || sector) instead, computed by integrity_discard_checksum(). | ||||
| CVE-2026-90332 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: PCI: dwc: ep: Flush cached MSI write before unmapping the iATU The MSI-X path already flushes any posted MSI-X write before tearing down its iATU mapping. That was added by commit c22533c66cca ("PCI: dwc: ep: Flush MSI-X write before unmapping its ATU entry") to make sure the write reaches the Root Complex before the outbound window that translates it disappears. The MSI path has the same problem but no equivalent flush. When the Endpoint driver caches an MSI target address and later observes that the Root Complex has changed it, dw_pcie_ep_raise_msi_irq() unmaps the existing iATU entry and reprograms it for the new address. Between the last MSI writel() and the unmap there may still be a posted write sitting in the fabric, and unmapping the iATU entry can drop or misroute that write. Fix this by reading back from the mapped MSI window before the unmap. The readback drains any posted MSI writes through the same iATU entry that mapped them, which is the same logic the MSI-X path uses. [mani: commit log] | ||||
| CVE-2026-90331 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: HID: asus: refactor the two workqueues and init sequence Multiple issues have been found within the hid-asus driver: - unchecked size in asus_raw_event() - unclean teardown of asus_probe on failure - possible use-after-free in asus_probe - multiple workqueue used for jobs where one was enough - sleeping calls in atomic context - packets of incorrect size being sent to the keyboard controller Join the two workqueues into one reusing the stopping mechanism of the brightness workqueue, use the joined workqueue to also move the asus_wmi_send_event() sleeping call away from atomic context and add a size check in asus_raw_event(). | ||||
| CVE-2026-90330 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: HID: logitech-hidpp: Fix FF device cleanup on init failure hidpp_ff_init() creates the input force-feedback device with input_ff_create(), then allocates the HID++ FF private data, effect ID array, and workqueue. If any of those allocations fail after input_ff_create() succeeds, the function returns an error without destroying the FF device. Add an unwind path that frees the private allocations made by hidpp_ff_init() and calls input_ff_destroy() for failures after input_ff_create() succeeds. | ||||
| CVE-2026-90329 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: HID: synchronize input before cleaning up a failed probe hid_device_io_start() allows reports to run concurrently with probe. If the probe subsequently fails, __hid_device_probe() releases driver resources and clears hdev->driver without first excluding those report callbacks. For example, a report may enter hidraw_report_event() while the failure path frees the associated hidraw object, leading to a use-after-free when the report takes the object's list lock. Stop input before performing failed-probe cleanup. This reacquires driver_input_lock and waits for any report callback already in progress. | ||||
| CVE-2026-90328 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: HID: steam: Reject short reads Steam Controller FEATURE reports encode the size of the message in the message itself. Previously we were trusting that the size reported matched the size we actually read, leading to a potential issue with short reads. Instead, we should actually verify the length of the read. | ||||
| CVE-2026-90327 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: phonet: pep: do not write beyond optlen in getsockopt pep_getsockopt() clamps the reported length to the caller's buffer with min_t(), but then stores the value with put_user(val, (int __user *) optval), which always writes sizeof(int) bytes. A getsockopt() call with an optlen smaller than sizeof(int) thus reports the clamped length yet writes a full int, one to three bytes past the user buffer. Write the value with copy_to_user() bounded by len, so at most optlen bytes are copied, matching the length reported back to userspace. | ||||
| CVE-2026-90326 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: blk-cgroup: fix race between policy activation and blkg destruction When switching an IO scheduler on a block device, blkcg_activate_policy() allocates blkg_policy_data (pd) for all blkgs attached to the queue. However, blkcg_activate_policy() may race with concurrent blkcg deletion, leading to use-after-free and memory leak issues. The use-after-free occurs in the following race: T1 (blkcg_activate_policy): - Successfully allocates pd for blkg1 (loop0->queue, blkcgA) - Fails to allocate pd for blkg2 (loop0->queue, blkcgB) - Enters the enomem rollback path to release blkg1 resources T2 (blkcg deletion): - blkcgA is deleted concurrently - blkg1 is freed via blkg_free_workfn() - blkg1->pd is freed T1 (continued): - Rollback path accesses blkg1->pd->online after pd is freed - Triggers use-after-free In addition, blkg_free_workfn() frees pd before removing the blkg from q->blkg_list. This allows blkcg_activate_policy() to allocate a new pd for a blkg that is being destroyed, leaving the newly allocated pd unreachable when the blkg is finally freed. Fix these races by extending blkcg_mutex coverage to serialize blkcg_activate_policy() rollback and blkg destruction, ensuring pd lifecycle is synchronized with blkg list visibility. | ||||
| CVE-2026-90325 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: blk-cgroup: skip dying blkg in blkcg_activate_policy() When switching IO schedulers on a block device, blkcg_activate_policy() can race with concurrent blkcg deletion, leading to a use-after-free in rcu_accelerate_cbs. T1: T2: blkg_destroy kill(&blkg->refcnt) // blkg->refcnt=1->0 blkg_release // call_rcu(__blkg_release) ... blkg_free_workfn ->pd_free_fn(pd) elv_iosched_store elevator_switch ... iterate blkg list blkg_get(blkg) // blkg->refcnt=0->1 list_del_init(&blkg->q_node) blkg_put(pinned_blkg) // blkg->refcnt=1->0 blkg_release // call_rcu again rcu_accelerate_cbs // uaf Fix this by checking hlist_unhashed(&blkg->blkcg_node) before getting a reference to the blkg. This is the same check used in blkg_destroy() to detect if a blkg has already been destroyed. If the blkg is already unhashed, skip processing it since it's being destroyed. | ||||
| CVE-2026-90324 | 1 Linux | 1 Linux Kernel | 2026-09-17 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: ublk: check import_ubuf() return value import_ubuf() can fail if the address range (provided by the userspace ublk server) is outside the allowed user address space. Return that 0 bytes were copied if import_ubuf() fails rather than passing an uninitialized struct iov_iter to ublk_copy_user_pages(). | ||||