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Vulnerabilidades357,881–357,920 · 367,284

CVECVSSEPSSKEVRExplotTítuloVis.

CVE-2026-745067.8 ALT

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: afs: Fix UAF when sending a message In afs_make_call(), there's a race with async call reception and destruction. If a call is dispatched that doesn't have call->write_iter set (used to specify the data content for FS.StoreData), then the first rxrpc_kernel_send_data() will not set MSG_MORE in the msghdr. Once rxrpc_send_data() queues the last request packet, the response could come in at any time and cause the call to be completed and put. However, afs_make_call() will look at the call again to see it ->write_iter should be handled - something it's only allowed to do if it has its own ref on the call. Whilst this is the case for synchronous calls, it isn't true for async calls such as FS.FetchData. There's also a potential UAF in afs_make_call() in the event that an asynchronous call is being sent, but the call fails in some way (e.g. it gets aborted from the server). The problem there is that afs_make_call() tries to abort a call if the rxrpc send fails, but the asynchronous notification from rxrpc may have caused the afs_call to be torn down. generic/650 plays games with randomly taking CPUs offline, and can interject a significant delay such that the call is deallocated before afs_make_call() gets to check call->write_iter - and a UAF ensues (caught by KASAN). BUG: KASAN: slab-use-after-free in afs_make_call+0x1c90/0x2210 [kafs] Read of size 8 at addr ffff888035e050e8 by task fsstress/1409 Fix this by making afs_make_op_call() give the op->call its own ref rather than transferring the caller's ref to it and then dropping the ref when afs_make_call() returns. This also means that the afs_make_call() func never loses its ref on the call now.15d CVE-2026-806857.1 ALT

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: mm/util: don't read __page_2 for order-1 folios in snapshot_page() snapshot_page() currently reads __page_2 after checking nr_pages > 1, but it should only do so when nr_pages > 2. If an order-1 folio is allocated at the end of a vmemmap section, __page_2 will not exist and reading it will cause a fault. During DLPAR memory remove on a 22 TB ppc64le LPAR, snapshot_page() oopsed on the page isolation path while reading an order-1 folio's __page_2 from an adjacent absent section (unmapped vmemmap). Fix this to avoid reading memmap that doesn't exist (e.g., a vmemmap hole).3d CVE-2026-514008.4 ALT

2.4%

——1An issue in Vim Project v9.2.0389 and earlier allows a local attacker to execute arbitrary code via the vms_fixfilename() function within file vim/src/os_vms.c27d CVE-2026-44523—

2.4%

——1——CVE-2026-806627.1 ALT

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: cxl: Fix CXL_HEADERLOG_SIZE to match RAS Capability size The CXL r4.0 8.2.4.17.7 RAS Capability Structure has total length 0x58 bytes (CXL_RAS_CAPABILITY_LENGTH); the Header Log occupies the trailing 64 bytes at offset 0x18. CXL_HEADERLOG_SIZE was defined as SZ_512, eight times the actual on-device size. header_log_copy() reads CXL_HEADERLOG_SIZE_U32 (128) dwords from the RAS capability iomap, overrunning the 88-byte mapping by 448 bytes. The cxl_aer_uncorrectable_error trace event memcpy()s CXL_HEADERLOG_SIZE (512) bytes from its source. For the CPER caller the source is struct cxl_ras_capability_regs::header_log[16] (64 bytes) embedded in a stack-local cxl_cper_prot_err_work_data, so the memcpy reads 448 bytes of kernel stack into the trace event ring buffer where userspace can read it via tracefs. Set CXL_HEADERLOG_SIZE to 64 and derive CXL_HEADERLOG_SIZE_U32 from it, bringing all iomap readers into agreement on 16 dwords. Userspace tools such as rasdaemon have grown a dependency on the buggy 512-byte (128 u32) header_log layout in the cxl_aer_uncorrectable_error trace event. Add CXL_HEADERLOG_TRACE_SIZE_U32 = 128 and use it for the trace event __array and its memcpy to preserve that ABI. Both callers now pass a zero-filled u32[CXL_HEADERLOG_TRACE_SIZE_U32] staging buffer with only the first CXL_HEADERLOG_SIZE_U32 (16) entries populated from hardware; the remaining 112 u32s are zero-padded, keeping the 512-byte trace ring buffer layout intact. [ dj: Replaced 64 with SZ_64 per RichardC ]3d CVE-2025-55046—

2.4%

——1——CVE-2026-533715.5 MED

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: RDMA/ionic: bound node_desc sysfs read with %.64s node_desc[64] in struct ib_device is not guaranteed to be NUL- terminated. The core IB sysfs handler uses "%.64s" for exactly this reason (drivers/infiniband/core/sysfs.c:1307), since node_desc_store() performs a raw memcpy of up to IB_DEVICE_NODE_DESC_MAX bytes with no NUL termination: memcpy(desc.node_desc, buf, min_t(int, count, IB_DEVICE_NODE_DESC_MAX)); If exactly 64 bytes are written via the node_desc sysfs file, the array contains no NUL byte. The ionic hca_type_show() handler uses unbounded "%s" and will read past the end of node_desc into adjacent fields of struct ib_device until it encounters a NUL. ionic supports IB_DEVICE_MODIFY_NODE_DESC, so this is triggerable by userspace. Match the core handler and bound the format specifier.34d CVE-2026-533675.5 MED

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: selinux: fix avdcache auditing The per-task avdcache was incorrectly saving and reusing the audited vector computed by avc_audit_required() rather than recomputing based on the currently requested permissions and distinguishing the denied versus allowed cases. As a result, some permission checks were not being audited, e.g. directory write checks after a previously cached directory search check. [PM: line wrap tweaks]34d CVE-2026-638237.8 ALT

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: keys: Pin request_key_auth payload in instantiate paths A: request_key() B: KEYCTL_INSTANTIATE_IOV ================ ========================= create auth key store rka in auth key wait for helper get auth key load rka from auth key copy user payload sleep on #PF helper completed detach and free rka destroy auth key wake up use rka->target_key **USE-AFTER-FREE** Give request_key_auth payloads a refcount. Take a payload reference while authkey->sem stabilizes the payload and revocation state. Hold that reference across the instantiate and reject paths. Drop the auth key owning reference from revoke and destroy. [jarkko: Replaced the first two paragraphs of text with an actual concurrency scenario.]15d CVE-2023-40371—

2.4%

——1——CVE-2026-640507.8 ALT

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: drm/msm/dpu: don't mix devm and drmm functions Mixing devm and drmm functions will result in a use-after-free on msm driver teardown if userspace keeps a reference on the drm device: The WB connector data will be destroyed because of the use of devm_kzalloc()), while the usersoace still can try interacting with the WB connector (which uses drmm_ functions). Change dpu_writeback_init() to use drmm_. Patchwork: https://patchwork.freedesktop.org/patch/722656/33d CVE-2026-531975.5 MED

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: xfrm: iptfs: fix ABBA deadlock in iptfs_destroy_state() iptfs_destroy_state() calls hrtimer_cancel() while holding a spinlock that the timer callback also acquires, leading to an ABBA deadlock on SMP systems. For the output timer (iptfs_timer): - iptfs_destroy_state() holds x->lock, calls hrtimer_cancel() - iptfs_delay_timer() callback takes x->lock For the drop timer (drop_timer): - iptfs_destroy_state() holds drop_lock, calls hrtimer_cancel() - iptfs_drop_timer() callback takes drop_lock Both timers use HRTIMER_MODE_REL_SOFT, so their callbacks run in softirq context. When hrtimer_cancel() is called for a soft timer that is currently executing on another CPU, hrtimer_cancel_wait_running() spins on softirq_expiry_lock -- the same lock held by the softirq running the callback. If the callback is blocked waiting for the spinlock held by the caller of hrtimer_cancel(), a circular dependency forms: CPU 0: holds lock_A -> waits for softirq_expiry_lock CPU 1: holds softirq_expiry_lock -> waits for lock_A Fix by calling hrtimer_cancel() before acquiring the respective locks. hrtimer_cancel() is safe to call without holding any lock and will wait for any in-progress callback to complete. For the output timer, the lock is still acquired afterwards to drain the packet queue. For the drop timer, the lock/unlock pair is removed entirely since it only existed to serialize with the timer callback, which hrtimer_cancel() already guarantees. Found by source code audit.57d CVE-2026-638587.8 ALT

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: netfilter: nf_tables: add hook transactions for device deletions Restore the flag that indicates that the hook is going away, ie. NFT_HOOK_REMOVE, but add a new transaction object to track deletion of hooks without altering the basechain/flowtable hook_list during the preparation phase. The existing approach that moves the hook from the basechain/flowtable hook_list to transaction hook_list breaks netlink dump path readers of this RCU-protected list. It should be possible use an array for nft_trans_hook to store the deleted hooks to compact the representation but I am not expecting many hook object, specially now that wildcard support for devices is in place. Note that the nft_trans_chain_hooks() list contains a list of struct nft_trans_hook objects for DELCHAIN and DELFLOWTABLE commands, while this list stores struct nft_hook objects for NEWCHAIN and NEWFLOWTABLE. Note that new commands can be updated to use nft_trans_hook for consistency. This patch also adapts the event notification path to deal with the list of hook transactions.36d CVE-2026-529165.5 MED

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: batman-adv: frag: disallow unicast fragment in fragment batadv_frag_skb_buffer() is called by batadv_batman_skb_recv() when a BATADV_UNICAST_FRAG packet is received. Once all fragments are collected and the packet is reassembled, batadv_recv_frag_packet() calls batadv_batman_skb_recv() again to process the defragmented payload. A malicious sender can craft a BATADV_UNICAST_FRAG packet whose reassembled payload is itself a BATADV_UNICAST_FRAG packet (matryoshka-style nesting). Each nesting level recurses through batadv_batman_skb_recv() without bound, growing the kernel stack until it is exhausted. Since refragmentation or fragments in fragments are not actually allowed, discard all packets which are still BATADV_UNICAST_FRAG packets after the defragmentation process.55d CVE-2026-642145.5 MED

2.4%

2.4%

——1ChatterBot is a machine learning, conversational dialog engine for creating chat bots. Prior to 1.2.14, UbuntuCorpusTrainer.extract() uses a predictable home-rooted output directory (~/ubuntu_data/ubuntu_dialogs) with a check-then-create pattern followed by tar.extractall(path=self.data_path), allowing a local attacker who pre-plants a symlink at the predictable path to cause archive contents to be written through the symlink to an attacker-chosen directory. This issue is fixed in version 1.2.14.54d CVE-2026-644317.8 ALT

2.4%

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: drm/msm/dsi: don't dump registers past the mapped region On DSI 6G platforms the IO address space is internally adjusted by io_offset. Later this adjusted address might be used for memory dumping. However the size that is used for memory dumping isn't adjusted to account for the io_offset, leading to the potential access to the unmapped region. Lower ctrl_size by the io_offset value to prevent access past the mapped area. msm_disp_snapshot_add_block+0x1d4/0x3c8 [msm] (P) msm_dsi_host_snapshot+0x4c/0x78 [msm] msm_dsi_snapshot+0x28/0x50 [msm] msm_disp_snapshot_capture_state+0x74/0x140 [msm] msm_disp_snapshot_state_sync+0x60/0x90 [msm] _msm_disp_snapshot_work+0x30/0x90 [msm] kthread_worker_fn+0xdc/0x460 kthread+0x120/0x140 Patchwork: https://patchwork.freedesktop.org/patch/721747/20d CVE-2025-59854—

——1——CVE-2026-747337.8 ALT

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: gpio: pca953x: fix pca953x_irq_bus_sync_unlock regmap lock Locking is disabled in the regmap config as this driver uses its own lock. This means that all calls to regmap functions (read or write) must hold the i2c_lock. The function pca953x_irq_bus_sync_unlock() did not do this, and it was therefore possible that multiple threads could cause an incorrect register to be read/written. A previous patch partly fixed this, but only protected the write to the interrupt mask register, and not the read from the direction register.7d CVE-2025-71157—

2.4%

——1——CVE-2026-234605.5 MED

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: net/rose: fix NULL pointer dereference in rose_transmit_link on reconnect syzkaller reported a bug [1], and the reproducer is available at [2]. ROSE sockets use four sk->sk_state values: TCP_CLOSE, TCP_LISTEN, TCP_SYN_SENT, and TCP_ESTABLISHED. rose_connect() already rejects calls for TCP_ESTABLISHED (-EISCONN) and TCP_CLOSE with SS_CONNECTING (-ECONNREFUSED), but lacks a check for TCP_SYN_SENT. When rose_connect() is called a second time while the first connection attempt is still in progress (TCP_SYN_SENT), it overwrites rose->neighbour via rose_get_neigh(). If that returns NULL, the socket is left with rose->state == ROSE_STATE_1 but rose->neighbour == NULL. When the socket is subsequently closed, rose_release() sees ROSE_STATE_1 and calls rose_write_internal() -> rose_transmit_link(skb, NULL), causing a NULL pointer dereference. Per connect(2), a second connect() while a connection is already in progress should return -EALREADY. Add this missing check for TCP_SYN_SENT to complete the state validation in rose_connect(). [1] https://syzkaller.appspot.com/bug?extid=d00f90e0af54102fb271 [2] https://gist.github.com/mrpre/9e6779e0d13e2c66779b1653fef8051639d CVE-2026-347785.9 MED

2.4%

——1Electron is a framework for writing cross-platform desktop applications using JavaScript, HTML and CSS. Prior to versions 38.8.6, 39.8.1, 40.8.1, and 41.0.0, a service worker running in a session could spoof reply messages on the internal IPC channel used by webContents.executeJavaScript() and related methods, causing the main-process promise to resolve with attacker-controlled data. Apps are only affected if they have service workers registered and use the result of webContents.executeJavaScript() (or webFrameMain.executeJavaScript()) in security-sensitive decisions. This issue has been patched in versions 38.8.6, 39.8.1, 40.8.1, and 41.0.0.39d CVE-2025-32353—

2.4%

——1——CVE-2026-460547.1 ALT

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: selinux: fix overlayfs mmap() and mprotect() access checks The existing SELinux security model for overlayfs is to allow access if the current task is able to access the top level file (the "user" file) and the mounter's credentials are sufficient to access the lower level file (the "backing" file). Unfortunately, the current code does not properly enforce these access controls for both mmap() and mprotect() operations on overlayfs filesystems. This patch makes use of the newly created security_mmap_backing_file() LSM hook to provide the missing backing file enforcement for mmap() operations, and leverages the backing file API and new LSM blob to provide the necessary information to properly enforce the mprotect() access controls.6d CVE-2026-234685.5 MED

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: drm/amdgpu: Limit BO list entry count to prevent resource exhaustion Userspace can pass an arbitrary number of BO list entries via the bo_number field. Although the previous multiplication overflow check prevents out-of-bounds allocation, a large number of entries could still cause excessive memory allocation (up to potentially gigabytes) and unnecessarily long list processing times. Introduce a hard limit of 128k entries per BO list, which is more than sufficient for any realistic use case (e.g., a single list containing all buffers in a large scene). This prevents memory exhaustion attacks and ensures predictable performance. Return -EINVAL if the requested entry count exceeds the limit (cherry picked from commit 688b87d39e0aa8135105b40dc167d74b5ada5332)39d CVE-2020-37020—

2.4%

——1——CVE-2026-43032—

2.4%

——1——CVE-2026-343824.6 MED

2.4%

——1Admidio is an open-source user management solution. From version 5.0.0 to before version 5.0.8, the delete mode handler in mylist_function.php permanently deletes list configurations without validating a CSRF token. An attacker who can lure an authenticated user to a malicious page can silently destroy that user's list configurations — including organization-wide shared lists when the victim holds administrator rights. This issue has been patched in version 5.0.8.39d CVE-2026-45834—

2.4%

——1——CVE-2026-45912—

2.4%

——1——CVE-2026-230605.5 MED

2.4%

——1In the Linux kernel, the following vulnerability has been resolved: crypto: authencesn - reject too-short AAD (assoclen<8) to match ESP/ESN spec authencesn assumes an ESP/ESN-formatted AAD. When assoclen is shorter than the minimum expected length, crypto_authenc_esn_decrypt() can advance past the end of the destination scatterlist and trigger a NULL pointer dereference in scatterwalk_map_and_copy(), leading to a kernel panic (DoS). Add a minimum AAD length check to fail fast on invalid inputs.49d CVE-2026-169338.2 ALT

2.4%

——1IBM Power Systems Firmware FW1120.00, FW1110.00 through FW1110.30, FW1060.00 through FW1060.80, FW950.00 through FW950.H2, OP940.00 through OP940.a1 (Power9), and OP940.00 through OP940.81 (Power HMC) is affected by a vulnerability in the interface between the BMC/FSP and the host system. An attacker with service account or root access to the BMC/FSP can read and write arbitrary regions of host system memory, giving full control over the host system and all hosted partitions, resulting in a confidentiality, integrity, and availability impact.7d CVE-2021-0695—