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          "value": "In the Linux kernel, the following vulnerability has been resolved:\n\next4: fix e4b bitmap inconsistency reports\n\nA bitmap inconsistency issue was observed during stress tests under\nmixed huge-page workloads. Ext4 reported multiple e4b bitmap check\nfailures like:\n\next4_mb_complex_scan_group:2508: group 350, 8179 free clusters as\nper group info. But got 8192 blocks\n\nAnalysis and experimentation confirmed that the issue is caused by a\nrace condition between page migration and bitmap modification. Although\nthis timing window is extremely narrow, it is still hit in practice:\n\nfolio_lock                        ext4_mb_load_buddy\n__migrate_folio\n  check ref count\n  folio_mc_copy                     __filemap_get_folio\n                                      folio_try_get(folio)\n                                  ......\n                                  mb_mark_used\n                                  ext4_mb_unload_buddy\n  __folio_migrate_mapping\n    folio_ref_freeze\nfolio_unlock\n\nThe root cause of this issue is that the fast path of load_buddy only\nincrements the folio\u0027s reference count, which is insufficient to prevent\nconcurrent folio migration. We observed that the folio migration process\nacquires the folio lock. Therefore, we can determine whether to take the\nfast path in load_buddy by checking the lock status. If the folio is\nlocked, we opt for the slow path (which acquires the lock) to close this\nconcurrency window.\n\nAdditionally, this change addresses the following issues:\n\nWhen the DOUBLE_CHECK macro is enabled to inspect bitmap-related\nissues, the following error may be triggered:\n\ncorruption in group 324 at byte 784(6272): f in copy != ff on\ndisk/prealloc\n\nAnalysis reveals that this is a false positive. There is a specific race\nwindow where the bitmap and the group descriptor become momentarily\ninconsistent, leading to this error report:\n\next4_mb_load_buddy                   ext4_mb_load_buddy\n  __filemap_get_folio(create|lock)\n    folio_lock\n  ext4_mb_init_cache\n    folio_mark_uptodate\n                                     __filemap_get_folio(no lock)\n                                     ......\n                                     mb_mark_used\n                                       mb_mark_used_double\n  mb_cmp_bitmaps\n                                       mb_set_bits(e4b-\u003ebd_bitmap)\n  folio_unlock\n\nThe original logic assumed that since mb_cmp_bitmaps is called when the\nbitmap is newly loaded from disk, the folio lock would be sufficient to\nprevent concurrent access. However, this overlooks a specific race\ncondition: if another process attempts to load buddy and finds the folio\nis already in an uptodate state, it will immediately begin using it without\nholding folio lock."
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              "value": "AV:L - The vulnerability is reached through local filesystem block-allocation activity combined with local folio migration (compaction/NUMA/huge-page reclaim), which is a kernel memory-management event an attacker induces locally; there is no remote path that controls the migration side of the race.\nAC:L - The attacker controls both sides of the race\u2014heavy block-allocation I/O plus memory pressure that forces folio migration\u2014and the commit confirms the window \"is still hit in practice\" under sustained workloads, so it is reliably reproducible by an attacker-constructed workload.\nPR:L - An ordinary unprivileged local user with write access to any ext4 filesystem (e.g., /tmp or /home) can drive block allocation and induce memory migration; no elevated capabilities are required.\nUI:N - The attacker performs all actions (file writes plus memory pressure) on an already-mounted filesystem with no action by any other user.\nS:U - The corruption is confined to the ext4 filesystem and kernel within the same security authority; no VM, sandbox, or IOMMU boundary is crossed.\nC:H - A lost bitmap update can cause block double-allocation, assigning the same physical block to two inodes so one user can read data written by another on a shared filesystem, constituting significant information disclosure.\nI:H - The race corrupts buddy-bitmap/group-descriptor consistency and can double-allocate blocks, leading to file-data corruption (one file\u0027s writes overwriting another\u0027s) and persistent on-disk metadata inconsistency.\nA:H - Detected inconsistency invokes ext4_grp_locked_error()/ext4_handle_error(), which aborts the journal and remounts the filesystem read-only (or panics the kernel with errors=panic), rendering the filesystem\u2014potentially the root filesystem\u2014unavailable."
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          "lang": "en",
          "value": "In the Linux kernel, the following vulnerability has been resolved:\n\nKVM: nSVM: Raise #UD if unhandled VMMCALL isn\u0027t intercepted by L1\n\nExplicitly synthesize a #UD for VMMCALL if L2 is active, L1 does NOT want\nto intercept VMMCALL, nested_svm_l2_tlb_flush_enabled() is true, and the\nhypercall is something other than one of the supported Hyper-V hypercalls.\nWhen all of the above conditions are met, KVM will intercept VMMCALL but\nnever forward it to L1, i.e. will let L2 make hypercalls as if it were L1.\n\nThe TLFS says a whole lot of nothing about this scenario, so go with the\narchitectural behavior, which says that VMMCALL #UDs if it\u0027s not\nintercepted.\n\nOpportunistically do a 2-for-1 stub trade by stub-ifying the new API\ninstead of the helpers it uses.  The last remaining \"single\" stub will\nsoon be dropped as well.\n\n[sean: rewrite changelog and comment, tag for stable, remove defunct stubs]"
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              "value": "AV:L - The path is reached by executing a VMMCALL instruction from within a nested (L2) guest running under KVM on AMD SVM; this is local execution against the hypervisor, not reachable via network, adjacent network, or physical interface.\nAC:L - Triggering is deterministic \u2014 once the nested setup exists (L1 does not intercept VMMCALL, e.g. relying on L0\u0027s Hyper-V direct L2 TLB-flush handling), a single VMMCALL in L2 reliably reaches L0\u0027s hypercall handler with no race or attacker-uncontrolled timing, mirroring sibling CVE-2026-43133.\nPR:L - The attacker must control a guest and run guest kernel-level (CPL0) code in the nested guest to set up and issue the hypercall; this is low privilege relative to the host and requires no real init-namespace root.\nUI:N - Exploitation is triggered solely by guest instruction execution (VMMCALL); no host-side or victim user action is required.\nS:C - The bug is in KVM\u0027s enforcement of the nested-virtualization boundary: L2\u0027s VMMCALL is serviced by L0 as if it were L1 instead of #UD\u0027ing, so an L2 guest\u0027s action reaches and affects L1/L0-maintained state outside the L2 guest\u0027s own security authority.\nC:L - The improperly-handled hypercalls cause L0 to read L1-context memory (guest-physical addresses supplied by L2 are interpreted in the L1/host-maintained address space) and inspect the vCPU\u0027s Hyper-V state \u2014 a bounded cross-domain exposure, not an arbitrary host read primitive.\nI:L - L2 can drive L0 hypercalls that modify L1/host-maintained state (inject IPIs into the VM\u0027s vCPUs, post SynIC messages/signal events, request GPA-range operations), a bounded cross-domain state modification rather than an arbitrary write or code-execution primitive.\nA:H - L2 can repeatedly issue these hypercalls to force TLB flushes, inject IPIs, and corrupt the L1 hypervisor\u0027s Hyper-V messaging state, destabilizing or hanging the affected nested-virtualization workload at will \u2014 a complete loss of availability for that workload."
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              "value": "AV:L - The flaw is in the Tegra Security Engine gcm(aes) driver reached via the kernel crypto API (AF_ALG socket syscalls); major network consumers call setauthsize and are not affected, and the driver only exists on Tegra234 platforms with TEGRA_HOST1X.\nAC:L - On affected Tegra systems with tegra-se loaded, an attacker reliably triggers the bug by issuing a GCM decrypt through AF_ALG without calling ALG_SET_AEAD_AUTHSIZE, relying on the default 16-byte tag while ctx-\u003eauthsize remains zero.\nPR:L - Triggering tegra GCM decrypt via AF_ALG requires only an unprivileged local user able to open AF_ALG sockets and bind to gcm(aes); no CAP_SYS_ADMIN, real root, or container-escaping capabilities are needed on standard configurations.\nUI:N - Exploitation requires no victim interaction such as mounting filesystems or opening files; the attacker directly submits crafted decrypt requests through the local crypto interface.\nS:U - Impact is kernel heap/memory corruption and potential privilege escalation within the same kernel security domain; it does not cross VM, container, or IOMMU boundaries.\nC:H - The out-of-bounds write corrupts memory adjacent to the destination scatterlist buffer; such heap corruption can expose kernel pointers or other sensitive data and is rated High per memory-corruption guidance.\nI:H - Decrypt uses an inflated cryptlen so scatterwalk_map_and_copy writes up to 16 bytes beyond the caller-allocated dst_sg buffer with no bounds checking, constituting an exploitable out-of-bounds write primitive.\nA:H - Writing past the destination scatterlist can corrupt adjacent kernel structures and cause kernel oops or panic; the fix commit explicitly describes this as a crash-causing out-of-bounds write condition."
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      "title": "crypto: tegra - fix rctx-\u003ecryptlen calculation in tegra_gcm_do_one_req()",
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              "value": "AV:N - C2HData is parsed on the nvme-tcp host socket path (nvme_tcp_data_ready -\u003e nvme_tcp_try_recv -\u003e nvme_tcp_recv_skb -\u003e nvme_tcp_recv_data) over routable TCP (typically 4420). A malicious or compromised NVMe-oF target, or an on-path injector into the default-unencrypted stream, triggers it from the network.\nAC:L - nvme_tcp_handle_c2h_data() sets queue-\u003edata_remaining from the attacker-controlled PDU data_length with no comparison to req-\u003edata_len. A short or zero-length C2HData with NVME_TCP_F_DATA_SUCCESS, or a short C2HData plus a success CQE, completes the read every time; no race or layout dependence.\nPR:N - The attacker is the NVMe-oF peer and needs no host account or capability. NVMe/TCP is unauthenticated by default (DH-HMAC-CHAP and TLS are optional), so a malicious, compromised, or spoofed target can short any in-flight read once the fabrics connection exists.\nUI:N - NVMe-oF controllers are persistent boot/autoconnect configuration and are re-established by nvme_tcp_error_recovery(). Namespace scan, partition probe, udev, and mounted-filesystem readahead issue REQ_OP_READ from kernel work without further victim action at attack time.\nS:U - Leftover host page-cache and buddy-page contents are exposed to local readers of the same kernel\u0027s NVMe device. No VM, IOMMU, or sandbox boundary is crossed.\nC:H - blk_mq_end_request() completes the full blk_rq_bytes, so userspace and page cache see leftover destination-page bytes as valid data. Those pages are not zeroed; sibling CVE-2026-89481 showed they hold stale kernel data including struct page pointers. Leak size is attacker-chosen up to the whole I/O, including a 0-length SUCCESS PDU.\nI:N - The bug under-fills the bio and reports success; it does not write out of bounds, free an object, or give a kernel write/hijack primitive. Bytes the target does send are data a storage controller already controls, and leftover bytes are prior page contents rather than attacker-chosen writes.\nA:N - The vulnerable path completes the request as success with no oops, panic, hang, deadlock, or leak. Availability of the host kernel is unaffected; error recovery (-EPROTO) exists only after the fix."
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          "value": "In the Linux kernel, the following vulnerability has been resolved:\n\nKVM: arm64: Handle negative S1 walk levels in VNCR TLB size evaluation\n\nComputing the effects of a TLB invalidation involves looking at\nthe size of the mapping cached by the TLB. For S1 mappings such as\nVNCR, this is deducted from the combination of the base granule size\nand the mapping level.\n\nHowever, this implies that the S1 MMU is *on*. When the MMU is off,\nwe indicate this with the level being set to a \"creative\" value of\n-127 (S1_MMU_DISABLED).\n\nThis ends-up being misinterpreted by pgshift_level_to_ttl() as it\ndoesn\u0027t handle negative levels at all (the level is immediately cast\nto a u8 and only the bottom two bits considered), leading to an\ninvalidation size of 0. Not helpful.\n\nTidy-up pgshift_level_to_ttl() to handle these negative levels, and\nttl_to_size() to always return SZ_1G when no valid TTL is present.\nThis allows the removal of open-coded checks for similar situations.\n\nNote that the check for a negative value not explicitely checking for\nS1_MMU_DISABLED is deliberate, so that actual negative levels introduced\nwith LVA2 and D128 can take the same path if we ever support them."
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