NOVA: a Log-Structured File System for Hybrid Volatile/Non
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Upgrading Cfengine Nova a Cfengine Special Topics Handbook
Upgrading CFEngine Nova A CFEngine Special Topics Handbook CFEngine AS This document describes how software updates work in CFEngine Nova. ¨ © Copyright c 2010- CFEngine AS 1 v i Table of Contents What does upgrading mean? ::::::::::::::::::::::::::::::::::::::::: 3 Why do I need to upgrade?::::::::::::::::::::::::::::::::::::::::::: 3 How does upgrading work? ::::::::::::::::::::::::::::::::::::::::::: 3 How can I do phased deployment? :::::::::::::::::::::::::::::::::::: 4 What if I have multiple operating system platforms? ::::::::::::::::::: 4 How do Nova policies update if I already have my own policy? ::::::::: 4 Appendix A Manual package upgrade commands ::::::: 5 3 What does upgrading mean? A software upgrade involves obtaining a new version of the CFEngine software from soft- ware.CFEngine.com and installing it in place of the old. When software is updated, the previous version of the software is retained. From version 1.1 of CFEngine Nova, CFEngine is fully capable of managing its own updates ¨ and service restarts with a minimum of manual work on the policy server. Existing users of version 1.0 will need to upgrade the software manually on the affected sys- tems, or use the existing CFEngine to assist in the manual process. Please contact CFEngine Professional Services for for assistance (see Appendix). © Why do I need to upgrade? Bug fixes and new features are included in new software releases. To gain access to these fixes, you need to upgrade the software. Changes to the standard Community Open Promise Body Library might make use of new features, so upgrading brings you access to these new methods. How does upgrading work? CFEngine packages its software in operating sytsem compatible package formats (RPM, PKG, MSI, etc). -
Copy on Write Based File Systems Performance Analysis and Implementation
Copy On Write Based File Systems Performance Analysis And Implementation Sakis Kasampalis Kongens Lyngby 2010 IMM-MSC-2010-63 Technical University of Denmark Department Of Informatics Building 321, DK-2800 Kongens Lyngby, Denmark Phone +45 45253351, Fax +45 45882673 [email protected] www.imm.dtu.dk Abstract In this work I am focusing on Copy On Write based file systems. Copy On Write is used on modern file systems for providing (1) metadata and data consistency using transactional semantics, (2) cheap and instant backups using snapshots and clones. This thesis is divided into two main parts. The first part focuses on the design and performance of Copy On Write based file systems. Recent efforts aiming at creating a Copy On Write based file system are ZFS, Btrfs, ext3cow, Hammer, and LLFS. My work focuses only on ZFS and Btrfs, since they support the most advanced features. The main goals of ZFS and Btrfs are to offer a scalable, fault tolerant, and easy to administrate file system. I evaluate the performance and scalability of ZFS and Btrfs. The evaluation includes studying their design and testing their performance and scalability against a set of recommended file system benchmarks. Most computers are already based on multi-core and multiple processor architec- tures. Because of that, the need for using concurrent programming models has increased. Transactions can be very helpful for supporting concurrent program- ming models, which ensure that system updates are consistent. Unfortunately, the majority of operating systems and file systems either do not support trans- actions at all, or they simply do not expose them to the users. -
The Page Cache Today’S Lecture RCU File System Networking(Kernel Level Syncmem
2/21/20 COMP 790: OS Implementation COMP 790: OS Implementation Logical Diagram Binary Memory Threads Formats Allocators User System Calls Kernel The Page Cache Today’s Lecture RCU File System Networking(kernel level Syncmem. Don Porter management) Memory Device CPU Management Drivers Scheduler Hardware Interrupts Disk Net Consistency 1 2 1 2 COMP 790: OS Implementation COMP 790: OS Implementation Recap of previous lectures Background • Page tables: translate virtual addresses to physical • Lab2: Track physical pages with an array of PageInfo addresses structs • VM Areas (Linux): track what should be mapped at in – Contains reference counts the virtual address space of a process – Free list layered over this array • Hoard/Linux slab: Efficient allocation of objects from • Just like JOS, Linux represents physical memory with a superblock/slab of pages an array of page structs – Obviously, not the exact same contents, but same idea • Pages can be allocated to processes, or to cache file data in memory 3 4 3 4 COMP 790: OS Implementation COMP 790: OS Implementation Today’s Problem The address space abstraction • Given a VMA or a file’s inode, how do I figure out • Unifying abstraction: which physical pages are storing its data? – Each file inode has an address space (0—file size) • Next lecture: We will go the other way, from a – So do block devices that cache data in RAM (0---dev size) physical page back to the VMA or file inode – The (anonymous) virtual memory of a process has an address space (0—4GB on x86) • In other words, all page -
The Kernel Report
The kernel report (ELC 2012 edition) Jonathan Corbet LWN.net [email protected] The Plan Look at a year's worth of kernel work ...with an eye toward the future Starting off 2011 2.6.37 released - January 4, 2011 11,446 changes, 1,276 developers VFS scalability work (inode_lock removal) Block I/O bandwidth controller PPTP support Basic pNFS support Wakeup sources What have we done since then? Since 2.6.37: Five kernel releases have been made 59,000 changes have been merged 3069 developers have contributed to the kernel 416 companies have supported kernel development February As you can see in these posts, Ralink is sending patches for the upstream rt2x00 driver for their new chipsets, and not just dumping a huge, stand-alone tarball driver on the community, as they have done in the past. This shows a huge willingness to learn how to deal with the kernel community, and they should be strongly encouraged and praised for this major change in attitude. – Greg Kroah-Hartman, February 9 Employer contributions 2.6.38-3.2 Volunteers 13.9% Wolfson Micro 1.7% Red Hat 10.9% Samsung 1.6% Intel 7.3% Google 1.6% unknown 6.9% Oracle 1.5% Novell 4.0% Microsoft 1.4% IBM 3.6% AMD 1.3% TI 3.4% Freescale 1.3% Broadcom 3.1% Fujitsu 1.1% consultants 2.2% Atheros 1.1% Nokia 1.8% Wind River 1.0% Also in February Red Hat stops releasing individual kernel patches March 2.6.38 released – March 14, 2011 (9,577 changes from 1198 developers) Per-session group scheduling dcache scalability patch set Transmit packet steering Transparent huge pages Hierarchical block I/O bandwidth controller Somebody needs to get a grip in the ARM community. -
Trusted Docker Containers and Trusted Vms in Openstack
Trusted Docker Containers and Trusted VMs in OpenStack Raghu Yeluri Abhishek Gupta Outline o Context: Docker Security – Top Customer Asks o Intel’s Focus: Trusted Docker Containers o Who Verifies Trust ? o Reference Architecture with OpenStack o Demo o Availability o Call to Action Docker Overview in a Slide.. Docker Hub Lightweight, open source engine for creating, deploying containers Provides work flow for running, building and containerizing apps. Separates apps from where they run.; Enables Micro-services; scale by composition. Underlying building blocks: Linux kernel's namespaces (isolation) + cgroups (resource control) + .. Components of Docker Docker Engine – Runtime for running, building Docker containers. Docker Repositories(Hub) - SaaS service for sharing/managing images Docker Images (layers) Images hold Apps. Shareable snapshot of software. Container is a running instance of image. Orchestration: OpenStack, Docker Swarm, Kubernetes, Mesos, Fleet, Project Docker Layers Atomic, Lattice… Docker Security – 5 key Customer Asks 1. How do you know that the Docker Host Integrity is there? o Do you trust the Docker daemon? o Do you trust the Docker host has booted with Integrity? 2. How do you verify Docker Container Integrity o Who wrote the Docker image? Do you trust the image? Did the right Image get launched? 3. Runtime Protection of Docker Engine & Enhanced Isolation o How can Intel help with runtime Integrity? 4. Enterprise Security Features – Compliance, Manageability, Identity authentication.. Etc. 5. OpenStack as a single Control Plane for Trusted VMs and Trusted Docker Containers.. Intel’s Focus: Enable Hardware-based Integrity Assurance for Docker Containers – Trusted Docker Containers Trusted Docker Containers – 3 focus areas o Launch Integrity of Docker Host o Runtime Integrity of Docker Host o Integrity of Docker Images Today’s Focus: Integrity of Docker Host, and how to use it in OpenStack. -
Rootless Containers with Podman and Fuse-Overlayfs
CernVM Workshop 2019 (4th June 2019) Rootless containers with Podman and fuse-overlayfs Giuseppe Scrivano @gscrivano Introduction 2 Rootless Containers • “Rootless containers refers to the ability for an unprivileged user (i.e. non-root user) to create, run and otherwise manage containers.” (https://rootlesscontaine.rs/ ) • Not just about running the container payload as an unprivileged user • Container runtime runs also as an unprivileged user 3 Don’t confuse with... • sudo podman run --user foo – Executes the process in the container as non-root – Podman and the OCI runtime still running as root • USER instruction in Dockerfile – same as above – Notably you can’t RUN dnf install ... 4 Don’t confuse with... • podman run --uidmap – Execute containers as a non-root user, using user namespaces – Most similar to rootless containers, but still requires podman and runc to run as root 5 Motivation of Rootless Containers • To mitigate potential vulnerability of container runtimes • To allow users of shared machines (e.g. HPC) to run containers without the risk of breaking other users environments • To isolate nested containers 6 Caveat: Not a panacea • Although rootless containers could mitigate these vulnerabilities, it is not a panacea , especially it is powerless against kernel (and hardware) vulnerabilities – CVE 2013-1858, CVE-2015-1328, CVE-2018-18955 • Castle approach : it should be used in conjunction with other security layers such as seccomp and SELinux 7 Podman 8 Rootless Podman Podman is a daemon-less alternative to Docker • $ alias -
F2FS) Overview
Flash Friendly File System (F2FS) Overview Leon Romanovsky [email protected] www.leon.nu November 17, 2012 Leon Romanovsky [email protected] F2FS Overview Disclaimer Everything in this lecture shall not, under any circumstances, hold any legal liability whatsoever. Any usage of the data and information in this document shall be solely on the responsibility of the user. This lecture is not given on behalf of any company or organization. Leon Romanovsky [email protected] F2FS Overview Introduction: Flash Memory Definition Flash memory is a non-volatile storage device that can be electrically erased and reprogrammed. Challenges block-level access wear leveling read disturb bad blocks management garbage collection different physics different interfaces Leon Romanovsky [email protected] F2FS Overview Introduction: Flash Memory Definition Flash memory is a non-volatile storage device that can be electrically erased and reprogrammed. Challenges block-level access wear leveling read disturb bad blocks management garbage collection different physics different interfaces Leon Romanovsky [email protected] F2FS Overview Introduction: General System Architecture Leon Romanovsky [email protected] F2FS Overview Introduction: File Systems Optimized for disk storage EXT2/3/4 BTRFS VFAT Optimized for flash, but not aware of FTL JFFS/JFFS2 YAFFS LogFS UbiFS NILFS Leon Romanovsky [email protected] F2FS Overview Background: LFS vs. Unix FS Leon Romanovsky [email protected] F2FS Overview Background: LFS Overview Leon Romanovsky [email protected] F2FS Overview Background: LFS Garbage Collection 1 A victim segment is selected through referencing segment usage table. 2 It loads parent index structures of all the data in the victim identified by segment summary blocks. -
Dm-X: Protecting Volume-Level Integrity for Cloud Volumes and Local
dm-x: Protecting Volume-level Integrity for Cloud Volumes and Local Block Devices Anrin Chakraborti Bhushan Jain Jan Kasiak Stony Brook University Stony Brook University & Stony Brook University UNC, Chapel Hill Tao Zhang Donald Porter Radu Sion Stony Brook University & Stony Brook University & Stony Brook University UNC, Chapel Hill UNC, Chapel Hill ABSTRACT on Amazon’s Virtual Private Cloud (VPC) [2] (which provides The verified boot feature in recent Android devices, which strong security guarantees through network isolation) store deploys dm-verity, has been overwhelmingly successful in elim- data on untrusted storage devices residing in the public cloud. inating the extremely popular Android smart phone rooting For example, Amazon VPC file systems, object stores, and movement [25]. Unfortunately, dm-verity integrity guarantees databases reside on virtual block devices in the Amazon are read-only and do not extend to writable volumes. Elastic Block Storage (EBS). This paper introduces a new device mapper, dm-x, that This allows numerous attack vectors for a malicious cloud efficiently (fast) and reliably (metadata journaling) assures provider/untrusted software running on the server. For in- volume-level integrity for entire, writable volumes. In a direct stance, to ensure SEC-mandated assurances of end-to-end disk setup, dm-x overheads are around 6-35% over ext4 on the integrity, banks need to guarantee that the external cloud raw volume while offering additional integrity guarantees. For storage service is unable to remove log entries documenting cloud storage (Amazon EBS), dm-x overheads are negligible. financial transactions. Yet, without integrity of the storage device, a malicious cloud storage service could remove logs of a coordinated attack. -
Providing User Security Guarantees in Public Infrastructure Clouds
1 Providing User Security Guarantees in Public Infrastructure Clouds Nicolae Paladi, Christian Gehrmann, and Antonis Michalas Abstract—The infrastructure cloud (IaaS) service model offers improved resource flexibility and availability, where tenants – insulated from the minutiae of hardware maintenance – rent computing resources to deploy and operate complex systems. Large-scale services running on IaaS platforms demonstrate the viability of this model; nevertheless, many organizations operating on sensitive data avoid migrating operations to IaaS platforms due to security concerns. In this paper, we describe a framework for data and operation security in IaaS, consisting of protocols for a trusted launch of virtual machines and domain-based storage protection. We continue with an extensive theoretical analysis with proofs about protocol resistance against attacks in the defined threat model. The protocols allow trust to be established by remotely attesting host platform configuration prior to launching guest virtual machines and ensure confidentiality of data in remote storage, with encryption keys maintained outside of the IaaS domain. Presented experimental results demonstrate the validity and efficiency of the proposed protocols. The framework prototype was implemented on a test bed operating a public electronic health record system, showing that the proposed protocols can be integrated into existing cloud environments. Index Terms—Security; Cloud Computing; Storage Protection; Trusted Computing F 1 INTRODUCTION host level. While support data encryption at rest is offered by several cloud providers and can be configured by tenants Cloud computing has progressed from a bold vision to mas- in their VM instances, functionality and migration capabil- sive deployments in various application domains. However, ities of such solutions are severely restricted. -
In Search of Optimal Data Placement for Eliminating Write Amplification in Log-Structured Storage
In Search of Optimal Data Placement for Eliminating Write Amplification in Log-Structured Storage Qiuping Wangy, Jinhong Liy, Patrick P. C. Leey, Guangliang Zhao∗, Chao Shi∗, Lilong Huang∗ yThe Chinese University of Hong Kong ∗Alibaba Group ABSTRACT invalidated by a live block; a.k.a. the death time [12]) to achieve Log-structured storage has been widely deployed in various do- the minimum possible WA. However, without obtaining the fu- mains of storage systems for high performance. However, its garbage ture knowledge of the BIT pattern, how to design an optimal data collection (GC) incurs severe write amplification (WA) due to the placement scheme with the minimum WA remains an unexplored frequent rewrites of live data. This motivates many research stud- issue. Existing temperature-based data placement schemes that ies, particularly on data placement strategies, that mitigate WA in group blocks by block temperatures (e.g., write/update frequencies) log-structured storage. We show how to design an optimal data [7, 16, 22, 27, 29, 35, 36] are arguably inaccurate to capture the BIT placement scheme that leads to the minimum WA with the fu- pattern and fail to group the blocks with similar BITs [12]. ture knowledge of block invalidation time (BIT) of each written To this end, we propose SepBIT, a novel data placement scheme block. Guided by this observation, we propose SepBIT, a novel data that aims to minimize the WA in log-structured storage. It infers placement algorithm that aims to minimize WA in log-structured the BITs of written blocks from the underlying storage workloads storage. -
ECE 598 – Advanced Operating Systems Lecture 19
ECE 598 { Advanced Operating Systems Lecture 19 Vince Weaver http://web.eece.maine.edu/~vweaver [email protected] 7 April 2016 Announcements • Homework #7 was due • Homework #8 will be posted 1 Why use FAT over ext2? • FAT simpler, easy to code • FAT supported on all major OSes • ext2 faster, more robust filename and permissions 2 btrfs • B-tree fs (similar to a binary tree, but with pages full of leaves) • overwrite filesystem (overwite on modify) vs CoW • Copy on write. When write to a file, old data not overwritten. Since old data not over-written, crash recovery better Eventually old data garbage collected • Data in extents 3 • Copy-on-write • Forest of trees: { sub-volumes { extent-allocation { checksum tree { chunk device { reloc • On-line defragmentation • On-line volume growth 4 • Built-in RAID • Transparent compression • Snapshots • Checksums on data and meta-data • De-duplication • Cloning { can make an exact snapshot of file, copy-on- write different than link, different inodles but same blocks 5 Embedded • Designed to be small, simple, read-only? • romfs { 32 byte header (magic, size, checksum,name) { Repeating files (pointer to next [0 if none]), info, size, checksum, file name, file data • cramfs 6 ZFS Advanced OS from Sun/Oracle. Similar in idea to btrfs indirect still, not extent based? 7 ReFS Resilient FS, Microsoft's answer to brtfs and zfs 8 Networked File Systems • Allow a centralized file server to export a filesystem to multiple clients. • Provide file level access, not just raw blocks (NBD) • Clustered filesystems also exist, where multiple servers work in conjunction. -
CS 5600 Computer Systems
CS 5600 Computer Systems Lecture 10: File Systems What are We Doing Today? • Last week we talked extensively about hard drives and SSDs – How they work – Performance characterisEcs • This week is all about managing storage – Disks/SSDs offer a blank slate of empty blocks – How do we store files on these devices, and keep track of them? – How do we maintain high performance? – How do we maintain consistency in the face of random crashes? 2 • ParEEons and MounEng • Basics (FAT) • inodes and Blocks (ext) • Block Groups (ext2) • Journaling (ext3) • Extents and B-Trees (ext4) • Log-based File Systems 3 Building the Root File System • One of the first tasks of an OS during bootup is to build the root file system 1. Locate all bootable media – Internal and external hard disks – SSDs – Floppy disks, CDs, DVDs, USB scks 2. Locate all the parEEons on each media – Read MBR(s), extended parEEon tables, etc. 3. Mount one or more parEEons – Makes the file system(s) available for access 4 The Master Boot Record Address Size Descripon Hex Dec. (Bytes) Includes the starEng 0x000 0 Bootstrap code area 446 LBA and length of 0x1BE 446 ParEEon Entry #1 16 the parEEon 0x1CE 462 ParEEon Entry #2 16 0x1DE 478 ParEEon Entry #3 16 0x1EE 494 ParEEon Entry #4 16 0x1FE 510 Magic Number 2 Total: 512 ParEEon 1 ParEEon 2 ParEEon 3 ParEEon 4 MBR (ext3) (swap) (NTFS) (FAT32) Disk 1 ParEEon 1 MBR (NTFS) 5 Disk 2 Extended ParEEons • In some cases, you may want >4 parEEons • Modern OSes support extended parEEons Logical Logical ParEEon 1 ParEEon 2 Ext.