text:
Lego Town Minifigures Lot | eBay Skip to main contenteBayShop bycategoryEnter your search keywordAll Categories Advanced or register':' style="margin-right:3px">Hi, #USER#!'.replace(/#USER#/,a))+"")}catch(b){document.write("")}})();Hi, (Sign in to bid or buy)Daily DealsSellCustomer SupportMy eBayExpand My eBayNotifications
Lego Town Minifigures Lot
500+ BULK LEGO BUILDER BRICKS SPECIAL PARTS MINIFIG STAR WARS CASTLE TOWN LOT
This great bulkmix will contain over 500+ Lego brand standard and modified bricks, plates and slants plus plenty of modified bricks and special elements! 10h 39m left
Buy It Now Lego Minifig MEGA Lot over 250 pieces (Town, City, Animals, Technic, Hats)
A bunch of minifig accessories also included! Over +250 pieces are in this lot! What you see is what you get! These come from a smoke-free household.
Buy It Now 25 NEW LEGO MINIFIG LOT city town Men Women accessories minifigure people figure
Lego lot of minifigure extras parts for town LEGO weapons tools Windows Food
up for auction is a nice lot of Lego parts, all items in picture are included and in excellent clean condition.
Buy It Now 18 Lego Minifigures City Town Plus Matching Accessories Correct Assembly Lot MSU
By "correct assembly" we mean: These arenot just random minifigure pieces thrown together. We put a lot of care into assembling these. 20h 33m left
Lego 10 Minifigs Lot #2M (Astronaut, Islander, Pirate, Town, Studio, Soccer)
What you see is what you get! Minifig accessories included! These come from a smoke-free household.
Buy It Now LEGO LOT OF 15 BLUE TOWN MINIFIG LEGS PANTS HIPS PIECES TOWN CITY MORE 14d 13h 22m left
Lego Vintage Legoland Minifig Vintage City Town Bicycle Lot of 2
Lego Minifig/lot or Part Lot... Check out our other auctions for more Lego Items and Other Rare Toys and Collectibles. You will Receive the exact Figure in the photo!! All Items Include Delivery Confi...
Lego Lot Of 12 Various Minifigures City Town Minifig Figures Bulk NEW
All brand new genuine Lego parts you can mix and match. Please see photo for details.
Bid price:$14.06 12 bids
Big Lot of 15 Lego Legos Town/City Minifigs construction/girls/police/fire Lego Minifigs:15 minifigs from various town/city sets. Includes construction worker, fireman, girls, more. Vendio Images: More than just a pretty image. Condition: Used andale andalesell. 1d 19h 58m left
Buy It Now LEGO BULK LOT 2 OF 50 NEW MINIFIGURE HEADS TOWN NINJAGO SPACE MINIFIG PARTS
12 LEGO MINIFIG PEOPLE LOT grab bag of minifigure guys city town set
By "correct assembly" we mean: These arenot just random minifigure pieces thrown together. We put a lot of care into assembling these. 2d 20h 41m left
By "correct assembly" we mean: These arenot just random minifigure pieces thrown together. We put a lot of care into assembling these. 2d 20h 43m left
Buy It Now Lego Lot Of 5 Mini Figures On Skies / City/ Town /People/Men/ Ski/ Mountain /USA
Lot of 5 lego figures on skies, used in good shape. Get exactly what you see in the pictures. They will be complete as pictured . Look at my other auctions for more Legos. Good luck, happy bidding.
Buy It Now LEGO BULK LOT 2 OF 100 NEW MINIFIGURE HEADS TOWN NINJAGO SPACE MINIFIG PARTS
LEGO Mixed Tool Lot (x20) Huge Construction Race City Town Minifigure Accessory
Lego Huge Tool Lot as Pictured (x20) *See my many other Lego listings by clicking the links to the left* Thank you very much, *Please see policies below before bidding... 16h 36m left
Buy It Now Vintage Lego Town Minifigs Lot - 17 minifigures w/helmets, hats, etc. Nice Collection of LEGO TOWN minifigs. Assorted Minifigs. Minifigs are loose, in good condition - they are used/played with, but still great shape. 1 Red Jacket w/Zipper. 5d 11h 36m left
Lego Lot Of 16 Town Minifigures Boys Girls Brand New 11d 15h 9m left
LEGO Lot Of 10 Mini Figures W/ Accessories / City/ Town /People/Men/ Figs/ NICE
Lot of 10 lego figures, used in good shape. Get exactly what you see in the pictures. They will be complete as pictured . Look at my other auctions for more Legos. Good luck, happy bidding.
Buy It Now LEGO Lot Of 10 Mini Figures W/ Accessories / City/ Town /People/Men/ Figs/ NICE


text:
Madame de Pompadour by Nancy Mitford | 9781590175309 | NOOK Book (eBook) | Barnes & Noble
When Madame de Pompadour became the mistress of Louis XV, no one expected her to retain his affections for long. A member of the bourgeoisie rather than an aristocrat, she was physically too cold for the carnal Bourbon king, and had so many enemies that she could not travel publicly without risking a pelting of mud and stones. History has loved her little better.…
Madame de Pompadour available in
9781590175309
Nancy Mitford (1904–1973) was born into the British aristocracy and, by her own account, brought up without an education, except in riding and French. She managed a London bookshop during the Second World War, then moved to Paris, where she began to write her celebrated and successful novels, among them The Pursuit of Love and Love in a Cold Climate, about the foibles of the English upper class. Mitford was also the author of four biographies: Madame de Pompadour (1954), Voltaire in Love (1957), The Sun King (1966), and Frederick the Great (1970)—all available as NYRB classics. In 1967 Mitford moved from Paris to Versailles, where she lived until her death from Hodgkin’s disease.Amanda Foreman was born in London in 1968 and educated at Sarah Lawrence College, Columbia University, and Oxford University, where she received a Ph.D. in history. She is the author of Georgiana, Duchess of Devonshire, and A World on Fire; her new study, The World Made by Women: A History of Womankind from the Age of Cleopatra to the Era of Hillary Clinton, is forthcoming in 2016.
Madame de Pompadour 2.8 out of 5 based on 0 ratings.
Such a good balance between the world of treasure in which she lived, the rules she had to live by, and the life she made for herself. Anonymous

type: global

value: This website is an American bookseller. It is a Fortune 1000 company and the bookseller with the largest number of retail outlets in the United States.


text:
staber95 comments on Flowchart: Which Baseball Team should you root for?jump to contentmy subredditsannouncementsArtAskRedditaskscienceawwblogbookscreepydataisbeautifulDIYDocumentariesEarthPornexplainlikeimfiveFitnessfoodfunnyFuturologygadgetsgamingGetMotivatedgifshistoryIAmAInternetIsBeautifulJokesLifeProTipslistentothismildlyinterestingmoviesMusicnewsnosleepnottheonionOldSchoolCoolpersonalfinancephilosophyphotoshopbattlespicsscienceShowerthoughtsspacesportstelevisiontifutodayilearnedTwoXChromosomesUpliftingNewsvideosworldnewsWritingPromptsedit subscriptionsfront-all-random | AskReddit-television-Music-photoshopbattles-WritingPrompts-listentothis-movies-gaming-sports-history-pics-IAmA-Jokes-explainlikeimfive-Futurology-worldnews-nottheonion-Showerthoughts-food-mildlyinteresting-news-Fitness-tifu-todayilearned-space-books-nosleep-LifeProTips-DIY-creepy-dataisbeautiful-personalfinance-videos-OldSchoolCool-gifs-philosophy-gadgets-funny-TwoXChromosomes-science-askscience-aww-EarthPorn-GetMotivated-Documentaries-UpliftingNews-InternetIsBeautiful-Artmore » baseballcommentsrelatedother discussions (1)want to join? sign in or create an account in seconds|Englishlimit my search to /r/baseballuse the following search parameters to narrow your results:subreddit:subredditfind submissions in "subreddit"author:usernamefind submissions by "username"site:example.comfind submissions from "example.com"url:textsearch for "text" in urlselftext:textsearch for "text" in self post contentsself:yes (or self:no)include (or exclude) self postsnsfw:yes (or nsfw:no)include (or exclude) results marked as NSFWe.g. subreddit:aww site:imgur.com dogsee the search faq for details.advanced search: by author, subreddit...this post was submitted on 12 May 2013235 points (80% upvoted)shortlink: remember mereset passwordloginSubmit a LinkSubmit Textbaseballsubscribeunsubscribe119,237 readers797 users here now
a community for 6 yearsmessage the moderatorsMODERATORSTexas Rangersnobody554New York YankeesdtardifMinnesota Twinscardith_lordaSan Francisco GiantsNateTheGreat8Seattle Marinersswedishfish007It's time for Dodger baseball!FustrateMajor League BaseballBaseballBotMLB_Game_DiscussionBaltimore Oriolesavery_crudemanGlorious Smiter of Spam_depression...and 5 more »234235236Flowchart: Which Baseball Team should you root for? (bloggerstobenamedlater.com)submitted 1 year ago by New York Metsgopats850164 commentssharecancelsorry, this has been archived and can no longer be voted onloading...sorted by: besttopnewhotcontroversialoldrandomq & ayou are viewing a single comment's thread.view the rest of the comments →[–]Washington Nationalsstaber95 2 points3 points4 points 1 year ago (2 children)sorry, this has been archived and can no longer be voted onNo it's still a Nationals thing... Though this season has been better than the previous ones.
permalinkparent[–]Philadelphia PhilliesJeddHampton 0 points1 point2 points 1 year ago (1 child)sorry, this has been archived and can no longer be voted onI guess the few games I went to were an exception and not the rule. Thanks for the correction.
permalinkparent[–]Washington Nationalsstaber95 0 points1 point2 points 1 year ago (0 children)sorry, this has been archived and can no longer be voted onWell since I've been away at school I've only been to one game so far this season at Nats stadium, but from watching games you can still hear and compare the two crowds. But it depends on who's playing of course. In division games, and games against the Orioles have the most opposing fans, and then there's a few other teams that seem to bring a large number of opposing fans as well. (Detroit and Chicago Cubs fans stuck out to me as being oddly numerous.)
With the team still having only been around for less than a decade, we don't really have any 'lifetime fans' yet, and most of the people who are Nationals fans first either changed teams over that last 8 years, or didn't really follow baseball before we got our own team. There's also a lot of fans who will show up to multiple games a season, but consider the Nationals their second team so when their main team shows up they go to all 3 games in that gear then show up the next weekend wearing Nats gear again.
Based on what's happened with the Capitals, I think another few years of successful seasons should be enough finally finish winning the city over (yes with bandwagons- but their necessary to build a fanbase.)
TLDR: I write way to much. But it depends on who's playing, and DC is still building a fanbase in a city that I think is difficult to build a fanbase in.
permalinkparentaboutblogaboutteamsource codeadvertisejobshelpsite rulesFAQwikireddiquettetransparencycontact usapps & toolsAlien Blue iOS appmobile sitebuttons<3reddit goldreddit storeredditgiftsreddit.tvradio redditUse of this site constitutes acceptance of our User Agreement and Privacy Policy (updated). © 2015 reddit inc. All rights reserved.REDDIT and the ALIEN Logo are registered trademarks of reddit inc.create a new accountusername:password:verify password:email: (optional)remember mecreate accountsign inusername:password:remember mereset passwordsign inWe care about your privacy, and we never spam. By creating an account, you agree to reddit's User Agreement and Privacy Policy. We're proud of them, and you should read them.English [en]العربية [ar]Беларуская мова [be]български език [bg]Bosanski [bs]català [ca]česky [cs]dansk [da]Deutsch [de]Ελληνικά [el]English (Australia) [en-au]English (Canadian) [en-ca]English (Great Britain) [en-gb]English [en-us]Esperanto [eo]español [es]español [es-ar]eesti keel [et]Euskara [eu]فارسی [fa]suomi [fi]français [fr]Gàidhlig [gd]עברית [he]मानक हिन्दी [hi]hrvatski [hr]Magyar [hu]Հայերեն լեզու [hy]Bahasa Indonesia [id]íslenska [is] (*)italiano (Italy) [it]日本語 [ja]ಕನ್ನಡ [kn_IN]한국어 [ko]Latin [la]1337 [leet]LOL [lol]lietuvių kalba [lt]latviešu valoda [lv]Nederlands [nl]Nynorsk [nn]Norsk [no]Arrrrrrrr! [pir]polski [pl]português [pt] (*)português [pt-pt]português brasileiro [pt_BR]română [ro]русский [ru]slovenčina [sk]slovenščina [sl]српски језик [sr]Srpski [sr-la]Svenska [sv]தமிழ் [ta]ภาษาไทย [th]Türkçe [tr]українська мова [uk]Tiếng Việt [vi]中文 [zh] (*) incomplete volunteer to translateπ Rendered by PID 10415 on app-129 at 2015-03-03 00:10:33.526224+00:00 running cba21fc country code: US.

value: This website is an American social news aggregation, web content rating, and discussion website. Registered members submit content to the site such as links, text posts, images, and videos, which are then voted up or down by other members.


text:
Hayden vows to break free from India's shackles | cricket | Hindustan Times
Hayden vows to break free from India's shackles
The Indian bowlers -- Zaheer Khan in particular -- have so far successfully managed to tie him down, but Australia opener Matthew Hayden has vowed to bounce back when the third Test gets underway in Delhi from October 29.
cricket Updated: Oct 26, 2008 16:16 IST
The left-hander has managed just 42 in the first two Tests, with 29 being his top score, but said he has learnt from his mistakes.
"I won't change my strategy, but that aggression I showed in the second innings (in Mohali) is just how I want to play here," he said about his whirlwind 29 off 20 balls in Australia's losing encounter.
"I want to be strong at the ball and give myself the best chance to hit the ball. I am at a stage of the tour where I have hit a lot of the balls. I am confident with my hands and my feet," he was quoted as saying by 'Daily Telegraph'.
Hayden said his injury prevented him from playing enough cricket before coming to India and that he was a bit rusty.
"I almost did come here a bit short of cricket and momentum because of the achilles injury. You feel like you are playing catch-up a bit. But I feel confident and the second innings is how I know I play my best here," he said.
Hayden's explosive batting forced stand-in India skipper Mahendra Singh Dhoni to spread the field around despite the fact that Australia were chasing 516 to win.
"I think more than anything I am such a weapon here because I think as you saw, when I started attacking, they just got so defensive," he said.
"Then the game from that point is really an adjustment for me as well, because I have to switch out of that mode."
Hayden, who has scored 835 runs at an average of 49.11, has faltered this time with his technique of taking a big step to the line of the delivery.
"The Indians sit back and get the other side of the ball," Hayden said.
"In the second innings I started to do that as well. It's clearing your feet and using your eyes and hands to play the ball as opposed to moving your feet to the line of the ball and your head to the line of the ball," said the opener hoping that it would enable him to deal with India's pace duo of Ishant Sharma and Zaheer Khan.
Hayden is aware that failure in the next two Tests could see him in the firing line.
"Right now I have a lot of fight in me and I am enjoying the challenge of where I am at," he said admitting, "It's not all going my own way and me having to stretch myself and work a bit harder and understand there is going to be a transition into momentum."

value: This website is an Indian English-language daily newspaper introduced and founded in 1924 by Sunder Singh Lyallpuri, founder-father of the Akali movement and the Shiromani Akali Dal in the Punjab Province. It played integral roles in the Indian independence movement as a nationalist daily.


text:
Contemporary art : world currents (Book, 2011) [WorldCat.org]
http://www.worldcat.org/oclc/721925541
Title: Contemporary art : world currents
Publisher: London, U.K. : Laurence King Pub., 2011.
ISBN/ISSN: 9781856697163 1856697169
OCLC:721925541
London, U.K. : Laurence King Pub., 2011.
This text argues that, in recent decades, a worldwide shift from modern to contemporary art has occurred. This has not, however, been a uniform change from one phase or style in the history of art to another. Rather, artists everywhere have embraced the contemporary worlds diversity and complexity.
9781856697163 1856697169
721925541
348 pages : chiefly illustrations (some color) ; 30 cm
Pt I. Becoming Contemporary in Euroamerica. Late Modern Art Becomes Contemporary ; The Contemporary Art Boom --
pt. II The Transnational Transition ; Russia and (East of) Europe ; South and Central America, The Caribbean ; China and East Asia ; India, South and Southeast Asia ; Oceania ; Africa ; West Asia 236 --
pt. III Contemporary Concerns. World Pictures: Making Art Politically ; Climate Change: Art and Ecology ; Social Media: Affects of Time; Coda: Permanent Transition.
This book breaks new ground in tracing how modern, traditional and indigenous art became contemporary in each of cultural region of the world. The author argues that it is diversity, or the contemporaneity of difference, not a convergence towards sameness, which makes today's art contemporary.
Publisher Synopsis "Terry Smith is acknowledged world wide as the leading authority in the theory of contemporary art."-- Hans Belting, Professor for Art History and Media Theory, Academy for Design, Karlsruhe, Germany, from the Global Art and the Museum website. "Terry Smith is that rare art and social historian able to write criticism at once alert to the forces that contextualize art and sensitive to the elements and qualities that inhere to the works of art themselves."-College Art Association, citation for the 2010 Frank Jewett Mather Award for Art Criticism
Add tags for "Contemporary art : world currents".
Konst -- historia -- 2000-talet.
Sanat, Modern -- 21. y.y.
Sanat, Modern -- 20. y.y.
<http://www.worldcat.org/oclc/721925541> # Contemporary art : world currents
a schema:CreativeWork, schema:Book ; library:oclcnum "721925541" ; library:placeOfPublication <http://experiment.worldcat.org/entity/work/data/769407638#Place/london_u_k> ; # London, U.K.
library:placeOfPublication <http://id.loc.gov/vocabulary/countries/enk> ; schema:about <http://experiment.worldcat.org/entity/work/data/769407638#Topic/sanat_modern_21_y_y> ; # Sanat, Modern--21. y.y
schema:about <http://experiment.worldcat.org/entity/work/data/769407638#Topic/sanat_modern_20_y_y> ; # Sanat, Modern--20. y.y
schema:about <http://dewey.info/class/709.05/e23/> ; schema:about <http://experiment.worldcat.org/entity/work/data/769407638#Topic/konst_historia_2000_talet> ; # Konst--historia--2000-talet
schema:about <http://id.loc.gov/authorities/classification/N6497> ; schema:about <http://id.loc.gov/authorities/subjects/sh2002000548> ; # Art, Modern--21st century
schema:about <http://experiment.worldcat.org/entity/work/data/769407638#Event/1900_2099> ; # 1900 - 2099
schema:about <http://experiment.worldcat.org/entity/work/data/769407638#Topic/konst_historia_1900_talet> ; # Konst--historia--1900-talet
schema:bookFormat bgn:PrintBook ; schema:creator <http://experiment.worldcat.org/entity/work/data/769407638#Person/smith_terry_terry_e> ; # Terry E. Smith
schema:datePublished "2011" ; schema:description "Pt I. Becoming Contemporary in Euroamerica. Late Modern Art Becomes Contemporary ; The Contemporary Art Boom -- pt. II The Transnational Transition ; Russia and (East of) Europe ; South and Central America, The Caribbean ; China and East Asia ; India, South and Southeast Asia ; Oceania ; Africa ; West Asia 236 -- pt. III Contemporary Concerns. World Pictures: Making Art Politically ; Climate Change: Art and Ecology ; Social Media: Affects of Time; Coda: Permanent Transition."@en ; schema:description "This text argues that, in recent decades, a worldwide shift from modern to contemporary art has occurred. This has not, however, been a uniform change from one phase or style in the history of art to another. Rather, artists everywhere have embraced the contemporary worlds diversity and complexity."@en ; schema:exampleOfWork <http://worldcat.org/entity/work/id/769407638> ; schema:inLanguage "en" ; schema:name "Contemporary art : world currents"@en ; schema:productID "721925541" ; schema:publication <http://www.worldcat.org/title/-/oclc/721925541#PublicationEvent/london_u_k_laurence_king_pub_2011> ; schema:publisher <http://experiment.worldcat.org/entity/work/data/769407638#Agent/laurence_king_pub> ; # Laurence King Pub.
schema:workExample <http://worldcat.org/isbn/9781856697163> ; wdrs:describedby <http://www.worldcat.org/title/-/oclc/721925541> ; .
<http://dewey.info/class/709.05/e23/> a schema:Intangible ; .
<http://experiment.worldcat.org/entity/work/data/769407638#Agent/laurence_king_pub> # Laurence King Pub.
<http://experiment.worldcat.org/entity/work/data/769407638#Event/1900_2099> # 1900 - 2099
<http://experiment.worldcat.org/entity/work/data/769407638#Person/smith_terry_terry_e> # Terry E. Smith
a schema:Person ; schema:familyName "Smith" ; schema:givenName "Terry E." ; schema:givenName "Terry" ; schema:name "Terry E. Smith" ; .
<http://experiment.worldcat.org/entity/work/data/769407638#Place/london_u_k> # London, U.K.
<http://experiment.worldcat.org/entity/work/data/769407638#Topic/konst_historia_1900_talet> # Konst--historia--1900-talet
a schema:Intangible ; schema:name "Konst--historia--1900-talet"@en ; .
<http://experiment.worldcat.org/entity/work/data/769407638#Topic/konst_historia_2000_talet> # Konst--historia--2000-talet
a schema:Intangible ; schema:name "Konst--historia--2000-talet"@en ; .
<http://experiment.worldcat.org/entity/work/data/769407638#Topic/sanat_modern_20_y_y> # Sanat, Modern--20. y.y
a schema:Intangible ; schema:name "Sanat, Modern--20. y.y"@en ; .
<http://experiment.worldcat.org/entity/work/data/769407638#Topic/sanat_modern_21_y_y> # Sanat, Modern--21. y.y
a schema:Intangible ; schema:name "Sanat, Modern--21. y.y"@en ; .
<http://worldcat.org/isbn/9781856697163> a schema:ProductModel ; schema:isbn "1856697169" ; schema:isbn "9781856697163" ; .
<http://www.worldcat.org/title/-/oclc/721925541> a genont:InformationResource, genont:ContentTypeGenericResource ; schema:about <http://www.worldcat.org/oclc/721925541> ; # Contemporary art : world currents
<http://www.worldcat.org/title/-/oclc/721925541#PublicationEvent/london_u_k_laurence_king_pub_2011> a schema:PublicationEvent ; schema:location <http://experiment.worldcat.org/entity/work/data/769407638#Place/london_u_k> ; # London, U.K.
schema:organizer <http://experiment.worldcat.org/entity/work/data/769407638#Agent/laurence_king_pub> ; # Laurence King Pub.
Contemporary art : world currents/Terry Smith; London, U.K. : Laurence King Pub., 2011.

value: This website is a union catalog that itemizes the collections of 15,637 libraries in 107 countries that participate in the OCLC global cooperative. It is operated by OCLC, Inc.


text:
THE BEATLES PLEASE PLEASE ME 1963 UK LP 1N 1N EXCELLENT VINYL NEMS BAG | eBay Skip to main contenteBayShop by categoryEnter your search keywordAll CategoriesAdvanced or register':' style="margin-right:3px">Hello -User-.'.replace(/-User-/,escape(a)))+"")}catch(b){document.write("")}})();Hello (Sign in to bid or buy)Daily DealsSellHelp & ContactMy eBayExpand My eBaySummaryBids/OffersWatch ListWish ListAll ListsPurchase HistorySellingMy CollectionsFollowed SearchesMessagesCollect & Spend Learn moreNotification Back to home page
Details about THE BEATLES PLEASE PLEASE ME 1963 UK LP 1N 1N EXCELLENT VINYL NEMS BAG
The Beatles(1N/1N Vinyl LP)Please Plea...
THE BEATLES-PLEASE PLEASE ME UK MONO...
THE BEATLES ~ PLEASE PLEASE ME ...
WITH THE BEATLES ORIG 1963 UK LP...
BEATLES With The Beatles UK 1st Pre...
THE BEATLES YESTERDAY AND...
PAUL McCARTNEY ORIGINAL 1989 UK LP...
THE BEATLES BALLADS ORIGINAL...
THE BEATLES ORIGINAL 1963 UK 45 FROM...
THE BEATLES ORIGINAL 1969 NEW...
THE BEATLES ORIG 1964 SOUTH AFRICA...
THE BEATLES ORIGINAL 1965 ...
eBay item number:400708729747
Beatles Elvis Presley Led Zeppelin Beatles - Christmas Flexis Beatles - Memorabilia Beatles Related Paul McCartney Ringo Starr John Lennon George Harrison Apple Label Releases Cliff Richard 7" Singles LPs 60's Pop Progressive Rock Deep Purple Vertigo Swirl Harvest Pink Floyd Island Label Demos 50's Rock N Roll Folk Rock Beatles - Books Rolling Stones PINK FLOYD THE WHO Other paddysgoose Store
THIS IS A ORIGINAL 1963 UK PRESSING OF THE BEATLES 1ST U.K. LP.
ON PARLOPHONE PMC 1202 IN A NEMS ( NORTH EAST MUSIC STORES ) SLEEVE FOM BRIAN EPSTEINS LIVERPOOL RECORD SHOP
THE LABELS ARE EXCELLENT VERY CLEAN, NO WRITING, NO MARKS, K P T TAX CODE
THE VINYL IS NEAR EXCELLENT, VERY CLEAN AND BRIGHT , A FEW VERY FAINT MARKS ,PLAYS EXCELLENT
THE SLEEVE IS VERY GOOD PLUS, THE FRONT SLEEVE IS VERY CLEAN NO WRITING, NICE HIGH SHINE LANINATED COVER , THE TOP AND BOTTOM SEAMS IS VERY GOOD PLUS , LIGHT WEAR ON CORNERS, THE SPINE IS VERY CLEAR AND READABLE , THE BACK OF THE SLEEVE IS VERY GOOD, NO WRITING, SMALL TEAR TOP OPENING EDGE, THE BOTTOM FLIPOVER SEAM IS VERY GOOD PLUS, ALL PRINT IS CLEAR AND READABLE
IT IS A ERNEST J DAY ISUE
COMES COMPLETE WITH ORIGINAL EMITEX INNER SLLEVE IN EXCELLENT CONDITION THE NEMS PLASTIC SHOWS SOME WEAR AND HAS 2 SMALL HOLES IN IT THE MATRIX AND STAMPERS ARE
SIDE ONE XEX 421-1N STAMPERS 2 H G
SIDE TWO XEX 422-1N STAMPERS 3 L D
On 13-May-14 at 01:09:01 BST, seller added the following information:

value: This website is an American multinational e-commerce corporation based in San Jose, California, that facilitates consumer-to-consumer and business-to-consumer sales through its website.


text:
Madame Jeanne Guyon : experiencing union with God through inner prayer & the way and results of union with God (Book, 2001) [WorldCat.org]
I thought you might be interested in this item at http://www.worldcat.org/oclc/51519601 Title: Madame Jeanne Guyon : experiencing union with God through inner prayer & the way and results of union with God Author: Jeanne Marie Bouvier de La Motte Guyon; Harold J Chadwick Publisher: Gainesville, Fla. : Bridge-Logos Publishers, ©2001. ISBN/ISSN: 0882708732 9780882708737 OCLC:51519601
Madame Jeanne Guyon : experiencing union with God through inner prayer & the way and results of union with God
Jeanne Marie Bouvier de La Motte Guyon; Harold J Chadwick
Gainesville, Fla. : Bridge-Logos Publishers, ©2001.
Pure gold classic.
Find more information about: Jeanne Marie Bouvier de La Motte Guyon Harold J Chadwick
0882708732 9780882708737
51519601
revised in modern English by Harold J. Chadwick.
Add tags for "Madame Jeanne Guyon : experiencing union with God through inner prayer & the way and results of union with God". Be the first.
<http://www.worldcat.org/oclc/51519601> # Madame Jeanne Guyon : experiencing union with God through inner prayer & the way and results of union with God
library:oclcnum "51519601" ;
library:placeOfPublication <http://experiment.worldcat.org/entity/work/data/2854019692#Place/gainesville_fla> ; # Gainesville, Fla.
schema:about <http://experiment.worldcat.org/entity/work/data/2854019692#Topic/spiritual_life> ; # Spiritual life
schema:about <http://experiment.worldcat.org/entity/work/data/2854019692#Topic/prayer> ; # Prayer
schema:exampleOfWork <http://worldcat.org/entity/work/id/2854019692> ;
schema:isPartOf <http://experiment.worldcat.org/entity/work/data/2854019692#Series/pure_gold_classic> ; # Pure gold classic.
schema:name "Madame Jeanne Guyon : experiencing union with God through inner prayer & the way and results of union with God"@en ;
schema:productID "51519601" ;
schema:publication <http://www.worldcat.org/title/-/oclc/51519601#PublicationEvent/gainesville_fla_bridge_logos_publishers_2001> ;
schema:publisher <http://experiment.worldcat.org/entity/work/data/2854019692#Agent/bridge_logos_publishers> ; # Bridge-Logos Publishers
schema:workExample <http://worldcat.org/isbn/9780882708737> ;
wdrs:describedby <http://www.worldcat.org/title/-/oclc/51519601> ;
<http://experiment.worldcat.org/entity/work/data/2854019692#Agent/bridge_logos_publishers> # Bridge-Logos Publishers
schema:name "Bridge-Logos Publishers" ;
<http://experiment.worldcat.org/entity/work/data/2854019692#Place/gainesville_fla> # Gainesville, Fla.
<http://experiment.worldcat.org/entity/work/data/2854019692#Series/pure_gold_classic> # Pure gold classic.
schema:hasPart <http://www.worldcat.org/oclc/51519601> ; # Madame Jeanne Guyon : experiencing union with God through inner prayer & the way and results of union with God
schema:name "Pure gold classic." ;
schema:name "Pure gold classic" ;
<http://experiment.worldcat.org/entity/work/data/2854019692#Topic/prayer> # Prayer
<http://experiment.worldcat.org/entity/work/data/2854019692#Topic/spiritual_life> # Spiritual life
<http://worldcat.org/isbn/9780882708737>
schema:isbn "0882708732" ;
schema:isbn "9780882708737" ;
<http://www.worldcat.org/title/-/oclc/51519601>
schema:about <http://www.worldcat.org/oclc/51519601> ; # Madame Jeanne Guyon : experiencing union with God through inner prayer & the way and results of union with God
<http://www.worldcat.org/title/-/oclc/51519601#PublicationEvent/gainesville_fla_bridge_logos_publishers_2001>
schema:location <http://experiment.worldcat.org/entity/work/data/2854019692#Place/gainesville_fla> ; # Gainesville, Fla.
schema:organizer <http://experiment.worldcat.org/entity/work/data/2854019692#Agent/bridge_logos_publishers> ; # Bridge-Logos Publishers
Madame Jeanne Guyon : experiencing union with God through inner prayer & the way and results of union with God/Jeanne Marie Bouvier de La Motte Guyon; Harold J Chadwick; Gainesville, Fla. : Bridge-Logos Publishers, ©2001.


text:
3 bedroom semi-detached house for sale in Toddington Road, Near Leagrave Train Station, LU4
www.rightmove.co.uk/property/63764698
Toddington Road, Near Leagrave Train Station
** Exclusive to P&R Property sales ** Offered for sale is this lovely 3 bedroom house located a short walk form Leagrave station. and 5 minute drive from M1 motorway junction 11 or 11a. The property benefits from accommodation briefly comprising entrance hall, lounge open plan to dining room, kitchen, 3 first floor bedrooms, bathroom, gas central heating, double glazed windows, private garden, parking and garage.
Lounge - 4.82m x 4.23m (15'10" x 13'11") - Window to front, fireplace, radiator, open plan to:
Dining Area - 2.85m x 2.72m (9'4" x 8'11") - Radiator, patio door to garden, door to:
Kitchen - 2.74m x 2.34m (9'0" x 7'8") - Fitted with a matching range of base and eye level units with worktop space over, sink unit, fridge/freezer, washing machine and tumble dryer, fitted electric oven, built-in four ring hob, window to rear, door to Storage cupboard, door to garden
Bedroom 1 - 3.97m x 3.29m (13'0" x 10'10") - Window to rear, radiator.
Bedroom 2 - 3.70m x 3.29m (12'2" x 10'10") - Window to front, radiator.
Bedroom 3 - 2.74m x 2.44m (9'0" x 8'0") - Window to front, radiator,
Bathroom - Fitted with three piece suite comprising bath with shower attachment over, wash hand basin and close coupled WC, window to rear, radiator, door to:
Rear Garden - Paved patio area, laid to lawn, gate to garage and parking
Garage - Located in small block behind the property.
To view this media, please visit the on-line version of this page at www.rightmove.co.uk/property-for-sale/property-63764698.html
Disclaimer - Property reference 27575853. The information displayed about this property comprises a property advertisement. Rightmove.co.uk makes no warranty as to the accuracy or completeness of the advertisement or any linked or associated information, and Rightmove has no control over the content. This property advertisement does not constitute property particulars. The information is provided and maintained by P & R Property, Luton. Please contact the selling agent or developer directly to obtain any information which may be available under the terms of The Energy Performance of Buildings (Certificates and Inspections) (England and Wales) Regulations 2007 or the Home Report if in relation to a residential property in Scotland.
27 Feb 2018 104 Toddington Road, LU4 £250,000
09 Nov 2017 194 Toddington Road, LU4 £275,000

value: This website is a UK-based company that runs rightmove.co.uk, the UK's largest online real estate portal and property website. It is listed on the London Stock Exchange and is a constituent of the FTSE 100 Index.


text:
Cash L2 Prosesor | Cpu Cache | Central Processing Unit
Cash L2 Prosesor
Uploaded by M Adi Rama Doni
saveSave Cash L2 Prosesor For Later
04_Cache Memory CS 721 2
Processor Analysis: Generational Performance of Intel® Processors in an Expedient Cloud
Register File Caching for Energy Efficiency
ADV COMP ARCH DEC2002
Mtvbgbhgbvech_vbgbvlsi vcfgfbSyllabus 16
The XML Chip
Multicore Programming Practices
Breadth-First Search on a MapReduce One-Chip System
BeetleMIIplus_Datasheet
11-MIPS TLB Structure
Journal of Instruction-Level Parallelism 6 (2004) 116
Submitted 02/04; published 04/04
IRISA, Campus de Beaulieu 35042 Rennes Cedex, France
DOLBEAU @ IRISA . FR
Andr Seznec e
SEZNEC @ IRISA . FR
As the increasing of issue width has diminishing returns with superscalar processor, thread parallelism with a single chip is becoming a reality. In the past few years, both SMT (Simultaneous MultiThreading) and CMP (Chip MultiProcessor) approaches were rst investigated by academics and are now implemented by the industry. In some sense, CMP and SMT represent two extreme design points. In this paper, we propose to explore possible intermediate design points for on-chip thread parallelism in terms of design complexity and hardware sharing. We introduce the CASH parallel processor (for CMP And SMT Hybrid). CASH retains resource sharing a la SMT when such a sharing can be made non-critical for implementation, but resource splitting a la CMP whenever resource sharing leads to a superlinear increase of the implementation hardware complexity. For instance, sparsely used functional units (e.g. dividers), but also branch predictors and instruction and data caches, can be shared among several processor cores. CASH does not exploit the complete dynamic sharing of resources enabled on SMT. But it outperforms a similar CMP on a multiprogrammed workload, as well as on a uniprocess workload. Our CASH architecture shows that there exists intermediate design points between CMP and SMT.
Due to both technology improvements and advances in computer architecture, new generation general-purpose processors feature a long execution pipeline (20 stages on the Intel Pentium 4 [1]) and a superscalar execution core. However, as increasing issue width with superscalar processor has diminishing returns, thread parallelism with a single chip is becoming a reality. In the past few years, two approaches for implementing thread level parallelism on a chip have emerged and are now implemented by the industry: CMP (Chip MultiProcessor) [2, 3, 4, 5] and SMT (Simultaneous MultiThreading) [6, 7, 8, 9]. A CMP design essentially reproduces at chip level the (low-end) shared memory multiprocessor design that was used with previous generation machines. Due to the advance of technology, multiple 2 or 4-way issue (relatively) simple execution cores can be implemented on a single chip (for instance the recently released IBM Power4 processor [5, 10]). The underlying idea advocating for CMPs is that most of the benets of increasing the issue width will be counterbalanced by a deeper pipeline. It also implies that CPU intensive applications will have to be parallelized or multithreaded.
0. This work was partially supported by an Intel grant.
c 2004 AI Access Foundation and Morgan Kaufmann Publishers. All rights reserved.
D OLBEAU
S EZNEC
At the other end of the design spectrum, the SMT paradigm relies on a completely different approach. As pointed out by the designers of the canceled EV8 microprocessor [9], SMTs are essentially designed to achieve uniprocess performance with multithread performance being a bonus. But the SMT processor supports concurrent threads with very low granularity. That is, instructions from the parallel threads are concurrently progressing in the execution core and shares the hardware resources of the processor (functional units, caches, predictors, . . . ). The main difculty with SMTs implementation is induced by the implementation of a wide issue superscalar processor; the hardware complexities of the renaming logic, the issue logic, the register le and the bypass network increase super-linearly with the issue-width. CMP and SMT represent two extreme design points. With a CMP, no execution resource, apart from the L2 cache and the memory interfaces, is shared. A process cannot benet from any resource of distant processors. On a parallel or concurrent workload, after a context switch, a process may migrate from processor to processor leading to loss of instruction cache, data cache and branch prediction structures warming. On the other hand, with a SMT, single process performance is privileged. Total resource sharing allows to benet from prefetch effect and cache warming from other threads in a parallel workload. In this paper, we propose a median course, the CASH parallel processor (for CMP And SMT Hybrid). Instead of an all-or-nothing sharing policy, one can share only some of the resources. CASH retains resource sharing a la SMT when such a sharing can be made non-critical for the implementation, but resource splitting a la CMP whenever resource sharing leads to a superlinear increase of the implementation hardware complexity. For instance, sparsely or rarely used functional units (e.g. dividers), but also branch predictors, instruction caches and data caches, can be shared among several processor cores on a single-chip parallel processor. On the other hand, CASH keeps separated the major parts of the execution cores (rename logic, wake-up and issue logic, bypass network, register les) where wider issue implies higher hardware and design complexity. CASH can not exploit the complete dynamic sharing of resource enabled on SMT (particularly for single process) but retains part of the resource sharing advantage on concurrent workloads and parallel workloads. It is able to use the whole capacity of instruction and data caches and branch to processor predictors with single process workloads. A process migration from processor would not affect the performance of the I-cache and branch prediction structures. With a parallel application a thread prefetches the instructions and warm-up the predictor structures for one another. Sharing the data cache leads to similar prefetching and also avoids coherency trafc induced by the distributed L1 caches in a CMP. The remainder of the paper is organized as follows. In Section 2, we present in details the rationale for the CASH parallel processors. Our simulation framework is presented in Section 3. Section 4 analyzes simulation results on CASH parallel processors. Finally, Section 5 summarizes this study and presents future directions for this work.
2. Revisiting resource sharing for parallel processors
In few years, thread parallelism on a chip has moved from a concept to a reality. There are two major approaches: Chip MultiProcessor (Figure 1) and Simultaneous MultiThreading (Figure 2). When considering hardware resource sharing among the processes (illustrated in gray on Figures 1 and 2), the two approaches represent two extreme design points.
Private L1
Private L1 Private L1
Figure 1: Diagram of the sharing in a single-chip multi-processor.
4-way threaded core
Shared L1 Shared L2 Cache
Figure 2: Diagram of the sharing in a simultaneous multithreading processor.
Shared DL1
Figure 3: Diagram of the sharing in the proposed CASH.
In this section, we rst recall that the complexity of the execution core of a superscalar processor (i.e. the pipeline stages ranging from renaming to retirement) increases superlinearly with the issue width ([11]. For the pipeline stages ranging from register renaming to instruction validation, there is no comparison between the hardware complexity of a 4*N-issue superscalar SMT processor and the complexity of four N-issue processor in a CMP conguration. On the other hand, resources such as the I-cache, the data cache or the branch prediction structures can be shared at reasonable hardware cost and pipeline overhead. This stands also for longlatency functional units such as integer multipliers and dividers. Therefore, it becomes natural to consider intermediate designs between CMPs and SMTs with separate execution cores, but with shared instructions and data caches, branch prediction structures, and long-latency functional units. We call such an intermediate design, CASH (for CMP And SMT Hybrid). CASH is illustrated in Figure 3. Whenever a manufacturer chooses to implement multiple execution cores rather than a very wide issue execution core, CASH represents an alternative to a pure CMP architecture. 2.1 Complexity of wide issue superscalar core For the sake of simplicity, we assume the following pipeline organization: instruction fetch, instruction decode, register renaming, instruction dispatch, execution, memory access, write back, retire (see Figure 4). Some of these functional stages may span over several pipeline cycles. In a wide-issue superscalar processor, the hardware complexity of some of these functional stages increases super linearly and even near quadratically with the issue width. This is due to the dependencies that may exist among groups of instructions that are treated in parallel. All the paths must be dimensioned to be able to treat all the in-ight instructions as if they were all possibly dependent. For instance, let us consider the register renaming stage, the wake-up and issue logic and the operand fetch. The register renaming stage includes a global dependency check within a group of N instructions to be renamed in parallel. The complexity of this dependency checking is quadratic with the number
Shared IL1
Shared BP
I. Fetch
I. Dec. R. Ren & I. Disp.
Exec. / Mem. Acc.
I. Ret.
Figure 4: The stages of the simulated pipeline. of instructions. It also requires a single cycle read and update of a register map table. In a single cycle with two operands and one result instructions, 2N entries must be read and N entries must be overwritten. The complexity of the wake-up and issue logic also increases more than linearly with the issue width. Each entry in the wake-up logic must monitor the producer for each source operand. The number of comparators in each entry in the wake-up logic increases linearly with the issue width. As the total number of the in-ight instructions must also be increased, the total number of comparators in the wake-up logic raises near quadratically. If any instruction can be launched on any functional unit able to execute it (for instance, any ALU operation can be executed on any integer ALU), the complexity of the selection logic raises also quasi-quadratically with the issue width. As an alternative, distributed selection logic can be implemented at the expense of some freedom (and performance). For instance, the functional unit executing the instruction can be preselected at dispatch time. The complexity of operand fetch comes from two factors: the register le and the bypass network. The complexity of the register le in term of silicon area increases more than quadratically with the issue width. The silicon area required by a single register cell increases with the square of the number of register le ports. At the same time more physical registers are needed when the issue width is increased. The access time of the register le also increases dramatically. The number of bypass points required in the bypass network increases linearly, but the number of entries at each bypass point increases more than linearly and the length of result buses also increases. 2.2 Sharing resources in CASH The control of dependencies inside a wide-issue SMT superscalar processor results in very high hardware complexity on several functional stages in the pipeline. However some hardware resources needed by every processor could be shared on a multiple execution core processor. For CASH processors, we envisioned sharing long latency units, instruction caches, data caches and the branch predictor. 2.2.1 S PARSELY
USED LONG LATENCY UNITS
Some functional units are sparsely used in most applications and feature a long latency, for instance integer multipliers and dividers. These execution units also require a substantial silicon area compared with a simple ALU. Traditional uniprocessors must feature a copy of these functional units. Up to the mid 90s, the performance of these functional units were often sacriced to tradeoff smaller silicon area against latency with not so often used instructions. With CASH, several execution cores share long-latency execution units, since the contention for their use induces a low overhead. Control around these units will slightly lengthen their latency. However an extra cycle on a 20-cycle latency div is much less a concern than on a 1-cycle latency add.
As an alternative, one may consider to invest the total silicon area of the N slow dividers in a CMP in a single more efcient divider in CASH. One may also consider sharing a single pair of oating point units between two execution cores in CASH, or implementing a single multimedia unit. 2.2.2 I NSTRUCTION
CACHE AND BRANCH PREDICTOR SHARING
Replicating the instruction cache and branch prediction structures for every processor in a multiple execution core is a waste of resources. Instruction cache To feed a N-issue execution core, the instruction fetch engine must deliver an average throughput equal or higher than N instructions per cycle. The average size of the instruction block that could be fetched in parallel if the front-end is able to bypass not-taken branches is relatively high (8 to 12 instructions on many integer applications, more on oating point applications). Therefore, four 2-way issue execution cores (or two 4-way) could share a single instruction cache. At each cycle, a single process is granted the access to the instruction cache and a large block of contiguous instructions is read. Processors are granted access to the instruction cache in a round robin mode. Other more aggressive allocation policies can be designed as for SMTs [8]. Even with a capacity four times as large, a shared instruction cache hardware complexity would be in the same range as the hardware complexity of four instruction caches for four 2-way processors. Branch prediction structures Accurately predicting the address of the next instruction block is a challenging problem when the prediction must be performed in a single cycle. For instance, both Alpha EV6 [12] and Alpha EV8 [13] use (not so accurate) single-cycle line predictors backed with a 2-cycle complex instruction address generators that feature target re-computation, complex conditional branch computation, return address stack (and jump predictor for EV8). Whenever line prediction and address generation disagree, instruction fetch resumes with the address generated by the complex address generator. Due to this hierarchical structure, overfetching is implemented on the Alpha EV8 (i.e. two 8-instructions blocks are fetched on a single cycle.) In conjunction with the shared instruction cache proposed above, the next instruction address generator in CASH is also shared the same way. If N execution cores are implemented then the address for the next block does not need to be valid before N cycles. The shared instruction address generator hardware cost will be in the same range as replicating N address generators (about the same number of adders, but a wider multiplexor). The total budget for the branch prediction tables may be invested in a single but larger one. Moreover the hardware devoted to line prediction can be avoided while the need for overfetching associated with the poor line predictor accuracy disappears. A previous study [14] has shown that for global prediction schemes, a benet on branch prediction accuracy can be obtained from sharing tables, but imposes a return stack for each thread. 2.2.3 S HARING
In CASH, the data cache is shared between several processes. This leads either to the use of a multiported cache or to the use of a bank-interleaved cache.
The use of a multiported cache in a CASH processor avoids arbitration during accesses to the cache. But implementing a real multiported cache where each processor could grab an access to the same cache block during each cycle leads to a very expensive design. The silicon area devoted to a memory cell grows quadratically with the number of concurrent access ports. Moreover, the access time to a multiported memory array is longer than the access time to an equivalent size single ported one. Therefore, on a multiple execution core, replacing the distributed data caches by a single multiported cache is not cost-effective for access time as well as for total silicon area. For CASH processors, we propose to use a bank-interleaved structure. The cache can be implemented using single-ported banks. Arbitration is performed on the access to the banks and lengthens the access time. The access time will be further increased by a centralized access, i.e. the latency of the cache will be increased by a cycle or more. On the other hand, the total silicon budget devoted to the L1 data caches in a CMP can be invested in a single larger L1 data cache. 2.2.4 B ENEFITS
AND DRAWBACKS OF SHARING MEMORY STRUCTURES
There are a few similarities between sharing the data cache and sharing the instruction front end. Some extra hardware logic is induced by sharing instead of replicating the structures: arbitration + interleaving for the data cache, wider instruction fetch path + wider multiplexors + extra instruction buffers before decode for the instruction front end. Thus, sharing induces some extra cache access time and therefore slightly deepens the pipeline. Some benets from this sharing appear quite the same way for both structures. First, one can also invest in a single shared structure the total hardware budget that should have been spent on replicating several copies of the structure. The data cache, the instruction cache, the branch predictor can be implemented with larger capacities in comparison with distributed structures. For each structure, the total capacity is shared. A second benet of sharing is the simplication of L2 cache access. For instance, with a 4-way CMP, the L2 cache must arbitrate between requests from the four instruction caches and the four data caches (plus the system bus and the memory bus). Coherency must also be maintained between the L1 data caches. Therefore the total access time to the L2 cache is longer on CMP than on CASH. Benets of cache sharing are given below. 1. When a multiprogrammed workload is encountered, the capacity is dynamically shared among the different processes. In Section 4, we will see that this situation is most often benecial for performance. 2. When the workload is a single process, this situation is clearly benecial since the process can exploit the whole resource. 3. When a parallel workload is encountered, sharing is also benecial. Instructions are shared, i.e. less total capacity would be needed, and prefetched by a thread for another one. The branch prediction structures are warmed by the other parallel threads when global history schemes are used. The data cache benets from sharing and prefetching for read-only data as the instruction cache does. Moreover, on a CMP processor, the data caches of the different processors have to be maintained coherent. On CASH, there is no such need for maintaining data coherency. Thus bandwidth on the L1-L2 cache bus is saved.
4. With a shared memory multiprocessor and therefore with a CMP, the migration of a process from a processor to processor would result in a signicant performance loss due to a new cold start with cache memory and branch prediction structures. On a CASH processor, this situation is not an issue. As the processors share the caches, migration of a process incurred by the OS does not lead to cold start penalties on the memory hierarchy. Memory consistency On a CMP, snooping memory accesses is also used to maintain consistency on the speculative loads and stores internal to each processor cores. On CASH we enforce read after read dependencies on the same memory location inside each processor. That is, whenever two speculative loads on word X occur out of order inside a processor, the second load is squashed and re-issued. This allows to ensure that any (external) write on X seen by the rst load will be seen by the second load. This is consistent with the Alpha Shared Memory Model (see chapter 5 section 6 in [15]). 2.3 CASH design spectrum The total execution bandwidth of the CASH processor presented above is in practice limited by its instruction fetch bandwidth. We have assumed that a single block of contiguous instructions is fetched per cycle. For many applications, the average size of such blocks is not higher than 8 to 12. However, they are possibilities for sharing resources even if total issue bandwidth is higher. For instance, a larger total issue bandwidth could be obtained from a single instruction cache through 1) use of an interleaved bank structures and either fetching for two distinct processors on a single cycle or fetching two (possibly) non-contiguous fetch blocks (as on Alpha EV8 [13]) or 2) use of trace caches [16]. Different ways of resource sharing can also be considered. For instance, with a four execution cores chip, a pair of adjacent chips could share the instruction front-end and long-latency functional units. However the purpose of this paper is to illustrate the existence and viability of intermediate design points between CMPs and SMTs. Exploring the whole design spectrum is out of the scope of this paper. Therefore, we will limit our study to CASH processor with total execution bandwidth of eight instructions per cycle, that is either four 2-way execution cores or two 4-way execution cores.
3. Simulations framework and methodology
3.1 Simulated processor congurations We simulated two basic congurations for both CASH and CMP, a two 4-way execution core processors (CASH-2, CMP-2) and a four 2-way execution core processors (CASH-4, CMP-4). CASH and CMP differ by:
The rst-level instruction and data caches and the buses to the second-level cache;
The non-pipelined integer unit (used for complex instructions such as divide);
The non-pipelined oating-point unit (again used for complex instructions such as divide and square root extraction);
The branch predictor.
Component Level one data cache
Latency 3 (CASH) 2 (CMP) 1
Level one instruction cache
Level two cache Main memory
15 (CASH) 17 (CMP) 150
size 128KB (CASH-4) 64KB (CASH-2) 32 KB per core (CMP) 64 KB (CASH-4) 32 KB (CASH-2) 16 KB per core (CMP) 2 MB innite
associativity 4 (LRU) 8-way banked 2 (LRU)
4 (LRU) innite
Table 1: Latencies and sizes from the components of the memory hierarchy
The considered memory hierarchy is described in Table 1. The branch predictor is an hybrid skewed predictor 2Bc-gskew [17, 13]. The branch predictor uses four 64 Kbits shared tables and a 27 bits global history per thread in CASH, whereas each of the four predictors in the CMP used four 16 Kbits tables and a 21 bits global history. The other parameters are common to CASH and CMP. CASH-2 and CMP-2 can issue and retire 4 instructions per cycle in each core. Each core features two simples ALUs, one complex ALU (for the various MUL instructions), two simples FPUs, one branch dispatch unit, a pair of memory access units (can together emit one load and one load or store per cycle), one complex ALU (for the various integer DIV instructions) and one complex FPU (for the FDIV and FSQRT instructions). Those last two are shared by all the cores in the CASH processor. The four cores congurations could issue and retire 2 instructions per cycle in each core, with the same mix of available execution units in each core than above. Each core can support up to 32 in-ight instructions. The register banks (2 per thread, one for oating-point register, one for integer register) have enough renaming registers to rename all in-ight instructions. To avoid simulating the spill-and-ll system code associated with the SPARC windowed registers [18], an innite number of windows was assumed. The instruction fetch engine differs between CASH and the reference CMP. The conventional CMP is able to fetch 4 (for the 4 cores conguration) or 8 (for the 2 cores conguration) instructions per cycle, every cycle, for each processor. CASH can fetch up to 16 consecutive instructions, but only once every four cycles for a single processor. The CMP fetch engine is slightly more efcient, as it suffers less from short basic bloc terminated by a taken branch. Note that the instruction fetch engine assumed for CMP is very optimistic. Accurate branch prediction in a single cycle is not implemented on processors like EV6 for instance. Dispatching of the instructions is done out-oforder from a 32-instruction queue. The simulated pipeline is illustrated on Figure 4. In this gure, the grey areas are again those shared by the processor cores: only a single core can do an Instruction Fetch in a given cycle. The Memory Access is also shared, starting with the level 1 data cache (address computation is still private to a core). All other pipeline stages (Instruction Decode, Register Renaming & Instruction Dispatch, Execution, Instruction Retire) are private. The minimum misprediction penalty (fetch to fetch) of a mispredicted branch is 16 cycles, to account for full pipeline ush and recovery of wrong-path instructions (the simulator fetches but does not simulate wrong-path instructions). Note
that on a misprediction, a CASH core waits for its next instruction fetch slot, resulting in up to 3 extra penalty cycles. 3.2 Simulation environment Simulation results reported in this paper were obtained using a custom, cycle-accurate, trace-driven simulator. Executions traces were extracted using the CALVIN 2 toolset[19], based on the SALTO[20] system, and then fed to the simulator. CALVIN 2 is an instrumentation system running on SparcV9 hardware that includes an embedded functional simulator of the SparcV9 instruction set. The embedded simulator allows for fast-forwarding through uninteresting sections of code, such as the initialization phase of a program. This feature allows to simulate only the useful computational part of the code, and thus helps obtaining more signicant results. The simulated execution cores were highly detailed. Three simplications were made ; rst, perfect memory disambiguation ; second, perfect translation look-aside buffer and third, a perfect return addresses stack. On our benchmark set, these three components rarely miss when reasonably sized. All other features were accurately modeled, including contention on the various buses to the different levels of the memory hierarchy. millions instructions of Prior to execution, caches and predictors were warmed by running each benchmark (interleaved by chunks of thousands instructions) after skipping the initialization phase of the application. Sets of benchmarks were run together until the completion of at least millions instructions in each benchmark of the set. The exception was the simulation of the effect of contexts switches: each thread was then run to millions instructions, to be able to have reasonably long time-slice. 3.3 Benchmark set Our benchmark set is a subset of the SPEC CPU2000 benchmark suite (10 from the integer subset, and 10 from the oating-point subset). All benchmarks were compiled using the Sun C and Fortran compilers, targeted at the v8plus sub-architecture, with -xO3 and -fast optimizations for C and Fortran respectively. With a 4 execution cores conguration, 10 integer 4-thread workloads and 10 oating point 4thread workloads were considered. Each benchmark appears in 4 workloads. A set of chosen mixed FP/int workloads was also run. With a 2 execution cores conguration, 10 integer 2-thread workloads and 5 oating point 2thread workloads were considered. In addition to running fully multiprogrammed workloads, we also ran every benchmark alone on the four considered congurations. This allows to compare single-thread behavior of CMP and CASH. 3.4 Performance comparison methodology Fair performance comparison of hardware exploiting thread-level parallelism is a difcult issue (see for instance [21]) ; using average IPC may lead to biased results towards high IPC applications. In order to get a valid comparison of performances, we chose to compare the execution times process per process and for exactly the same slice of the application (i.e, millions instructions of the thread). That is, for a given thread, statistics were extracted after the rst millions instructions
5,0E+07 4,5E+07 4,0E+07 3,5E+07 Cycle 3,0E+07 2,5E+07 2,0E+07 1,5E+07 1,0E+07 5,0E+06
af ty er ex vp r gc c ip 2 ol f
CM P CASH
ip f gz mc 5. 6. 4. 1. 6. 17 17 18
Benchmar k
Figure 5: Average execution time of integer benchmarks in groups on the 4 cores congurations have been executed: the complete group of benchmarks continue to be simulated until the last thread has reached its statistic collection point. This method allows to compare the behavior of each individual thread on CASH and CMP for a given mix of benchmarks.
4.1 Multiprogrammed workloads Ten fully integer workloads were simulated on the 4-core chips and each benchmark was run 4 times in different environments. No group was performing entirely worse running on CASH than on CMP: at least one of the benchmark in the group performed better (i.e. completed the rst millions instructions in a shorter execution time) on CASH than on CMP. Precisely, two groups exhibited degradations on three benchmarks, ve groups on only one benchmark, and the remaining three groups showed improvements on all benchmarks. No single benchmark performed worse on all the four workloads. Three of them (164.gzip, 256.bzip2, 197.parser) performed better on a single run, and by only a tiny margin. One benchmark (181.mcf) did twice better and twice worse. But the remaining six benchmarks always performed better, and sometimes by a wide margin: between and for 176.gcc, between and for 186.crafty and between and for 255.vortex, an instruction cache-hungry benchmark. On Figure 5, we illustrate the average execution time for the 4 runs for all integer benchmarks. In average, the execution time is improved by when using CASH instead of CMP. Floating-point workloads exhibit more mitigated behaviors. All of the workloads except one presented mixed results. Three workloads had only one improved benchmark, ve exhibited two improved benchmarks, two had three improved benchmarks, and the last one performed better on all
 ! $ #%
 ! #"

 '
& &
 '&
3,5E+07
3,0E+07
2,0E+07 Cycle CM P CASH 1,5E+07
5,0E+06
0,0E+00 164.gzip 175.vpr 176.gc c 181.mcf 186.craft y 197.parser 254.ga p 255.vorte x 256.bzip 2 300.twolf Benchmar k
Figure 6: Execution time of integer benchmarks alone on the 4-way chips
benchmarks in the group. No group did worse on all benchmarks. Broken by benchmark, the results are also more mitigated. Four benchmarks (168.wupwise, 171.swim, 191.fma3d and 200.sixtrack) performed consistently better on CASH and four performing consistently worse (172.mgrid, 173.applu, 183.equake and 187.facerec). 178.galgel performed better only once, but with variation always below . Finally 301.apsi improved by about on three runs with one run slowed by about . The average execution time of all oating-point benchmarks improved by only going from the regular CMP to CASH. We also ran selected mixed workloads, with two integer and two oating-point benchmarks. Results were in line with the others, with none of the tested benchmarks performing noticeably worse than usual, and one (191.fma3d) performing better in a mixed workload. This result is due to the larger L1 data cache in CASH. Looking into specic components of the processor, we notice an almost negligible effect of the shared execution units due to the low frequency of such instructions. Sharing the branch predictor has a relatively small impact with prediction accuracies very similar on both CMP and CASH. The memory hierarchy on the other hand has a huge impact on performance. As expected, the benchmark with the best results on CASH are those with the most pathological behaviors: 255.vortex benets from a large instruction cache, 176.gcc has a similar behavior on a more modest scale. When run together, 255.vortex and 176.gcc both exhibit their most modest gain on CASH.
2-core chips 2-core simulations exhibit similar behavior as 4-core simulation, but in a smaller range. A modest average gain was encountered for integer workloads on CASH and an inwas encountered for oating-point workloads. signicant average loss of
 (
 ! #0
 )
 $ ! 21  ! #$
4.2 Single process workload Every benchmark was run alone on all the simulated congurations. On the 4-core chips, the four times larger caches on CASH-4 lead to performance improvement on every single benchmark. These results are illustrated for integer benchmarks on Figure 6. On the 2-core chips, performance for 2 of the 20 benchmarks (both oating-point) is lower on CASH-2 than on CMP-2, but by no more than . All others benchmarks were faster on CASH, albeit for some by a tiny margin.
Time Core 1 Core 2 Core 3 Core 4 thread 1 thread 2
per-process time slice
Figure 7: Thread rotation on 4 cores processors. Left is the 5-thread case, right is the 4-thread case.
4.3 Context switching workload We also studied the respective behaviors of CASH and CMP when the workload includes context switches. Our rst such workload was the usual 4-thread workload, but we added context switches in a round robin fashion: at regular interval, all threads would move to the previous core (see right side of gure 7.) We also simulated an excessive workload, i.e. a workload with more running processes than the number of available CPU cores. A time-slice was dened, and each process would run on one core for that time-slice before being suspended. Another process is then made to run on this core. The round-robin effect of running 5 processes on 4 cores is shown in gure 7, left side: each
context switch interval
round robin interval
 ! #$1
Core 1 Core 2 Core 3 Core 4 Time
process will return on a different core as the one it previously ran on, with a switch occurring inside the processor once each (time-slice in cycles / number of cores) cycles. For instance, thread 3 starts on core 4, leave room for thread 4, and return on core 3 after thread 2 is suspended. Simulations results were consistent with what one might expect: CASH is more resilient, performancewise to such contexts switches than a CMP. If the number of contexts switches is small in comparison of the number of instructions simulated, then the threads are slightly slowed on both CASH and CMP. There is a distinct advantage for CASH in the rst case (four threads round-robin) but this advantage is not distinguishable from the usual sharing effect in the second case (ve threads on four cores). The long interval during which the fth thread is sleeping results in the disappearance of its data and instructions from the caches.
7,00% 6,00% 5,00% 4,00% 3,00%
CASH CMP
2,00% 1,00% 0,00% 1,E+05 1,E+06 1,E+07
Switch interval (cycles)
Figure 8: Average performance loss, with a 10 millions cycles interval as reference. When the number of context switches is raised, the advantage of CASH is also raised (see gure 8): a thread running on a CMP always starts in a cold environment with regards to memory and prediction structures, whereas on CASH the environment is still warm (rst case) or is not completely cooled (second case). In particular, the shared branch predictor in CASH suffers much less from very frequent contexts switches than the 4 branch predictors in our CMP model. Even though this effect is not very noticeable for large time-slice, it is nonetheless interesting: It was shown in [22] that the major performance cost of a context switch is due to the cache structures and not the context saving. CASH diminishes this cache-trashing effect, and therefore would allow operating system designer to use shorter time-slice for a ner granularity of process execution. 4.4 Parallel workload Finally, we also simulated a subset of the SPLASH-2 [23] benchmarks suite, parallelized using POSIX threads. Traces were extracted from a 4-thread execution, after all threads were started (i.e. inside the function used in the PARMACS CREATE macro).
All simulated benchmarks exhibited some level of inter-threads sharing and prefetching. The positive effect of this sharing became more visible as the working set to cache size ratio became higher, i.e., by enlarging the working set or diminishing the cache size. CASH is the best performer whenever this ratio is high, thanks to a higher hit ratio on the memory hierarchy. When most of the working set (data and instructions) t in the cache(s), CASH and CMP are close performers, the benchmark execution time becoming dominated by internal execution. For instance, on our traces, the radix kernel from SPLASH-2 was dominated by the oating-point instructions (more than of the instructions, with a large number of double-precision multiplications). If the cache are big enough, the CMP naturally takes the edge thanks to a lower L1 latency. An exception to this is the behavior of the barnes application, were internal execution is dominated by long-latency oating-point instructions (see below subsection 4.6). 4.5 About sharing the L1 data cache Sharing the L1 data cache in CASH is not automatically positive with multiprocess workloads, since sharing induces an extra latency cycle with loads and may also generate some bank conicts. Assuming four execution cores, we ran simulations, both integer and oating-point, on a processor similar to CASH, but with the private, faster access L1 data cache and the longer latency L2 cache similar to CMP. The performance of this version was marginally (in average 1%) better than the performance of CASH. In particular, in most of the cases where CASH-4 was slower than CMP on an individual benchmark, performance close to CMP-4 was obtained. On the other hand, for single threaded workload, an almost consistent performance advantage was obtained using a shared data cache, with only a handful of benchmarks performing better on the private caches model. The marginal performance improvement on multiprogrammed performance is low, compared with the benet of larger caches for incomplete workload, and the benet of sharing data and instructions in a multithreaded workload. 4.6 About sharing sparsely used functional units As explained above (see 2.2.1), sparsely used functional units such as dividers can usually be shared between cores without sacrifying performances. Being sparsely used, there is usually very little contention on these units. When a single thread make intensive use of for instance the FDIV instruction, it does not suffer from contention if the other processes in the workload do not use the oating-point divider. However, the situation may be different for a multithreaded workload. When all threads exhibit the same behavior (as is usual for parallelized code), contention may occur. For instance, the barnes application in the SPLASH-2 benchmarks sets exhibits such a behavior. Performance on the CASH processor suffers, as the 4 threads are effectively serialized over the oating-point divider functional unit. Therefore, it can be cost-effective on CASH to implement a single, bigger, faster unit. This results in slightly better performance for single-threaded code than can use only one divider, and avoids excessive penalty on multithreaded code. In our experiment, halving the latency of the oating-point divider was enough to make CASH more than a match for CMP on the barnes benchslower with the usual full-latency unit on this specic mark, even though CASH was nearly multithreaded benchmark.
 '
 $
We also made experiments with CASH using shared oating-point units, even for more frequent instructions. Instead of connecting two units to each of the four cores, we only used four units, each connected to two adjacent cores. Each core had access to two units, but no two cores were connected to the same two units. The unit responsible for the oating-point division and square root instructions shared by all cores, with the usual high latencies. We then ran our oating-point benchmarks sets on this conguration. As one might expect, on all oating-point workloads, all benchmarks performed worse running on this conguration while mixed workload exhibited a similar behavior as regular CASH. The benchmark with the higher proportion of oating-point instructions in the trace (173.applu, 172.mgrid, 171.swim) naturally suffered the most, especially when put together on adjacent cores. Other benchmarks were slowed by a smaller amount.
The combined impacts of the advance in silicon technology and the diminishing return from implementing wider issue superscalar processor has made hardware thread parallelism a reality in commodity processors. Both CMPs and SMT processors are now offered by manufacturers. In this paper, we have shown that there exists an intermediate design point between CMP and SMT, the CASH parallel processor (for CMP And SMT Hybrid). Instead of an all-or-nothing sharing policy, CASH implements separate execution cores (as on CMPs) but shares the memory structures (caches, predictors) and rarely used functional units (as on SMTs). Whenever sharing allows to use larger memory structures (for caches and branch predictors), or to save material (rarely used functional units, but also line predictor), CASH implements it, even if it induces longer pipeline access and some arbitration. Whenever sharing induces superlinear complexity increase, CASH implements separate hardware: for instance register les, wake up and selection logic, and the bypass network. The simulation results presented in this paper illustrate that CASH competes favorably with a CMP solution on most workloads. In future studies, we will explore a wider design space. We also want to study (mostly) software solutions to enhance single process workload performance. For instance, sharing the caches among the core allows an helper thread (running on a different core) to prefetch instructions and data for the main thread.
[1] G. Hinton, D. Sager, M. Upton, D. Boggs, D. Carmean, A. Kyker, and P. Roussel, The microarchitecture of the pentium 4 processor, Intel Technology Journal, Q1 2001. [2] K. Olukotun, B. A. Nayfeh, L. Hammond, K. Wilson, and K.-Y. Chang, The case for a singlechip multiprocessor, in Architectural Support for Programming Languages and Operating Systems (ASPLOS-VII), pp. 211, 1996. [3] L. Hammond, B. A. Nayfeh, and K. Olukotun, A single-chip multiprocessor, Computer, vol. 30, pp. 7985, Sept. 1997. [4] L. A. Barroso, K. Gharachorloo, R. McNamara, A. Nowatzyk, S. Qadeer, B. Sano, S. Smith, R. Stets, and B. Verghese, Piranha: a scalable architecture based on single-chip multiprocessing, in Proceedings of the th Annual International Symposium on Computer Architecture: June 1214, 2000, Vancouver, British Columbia, (New York, NY, USA), ACM Press, 2000. [5] K. Diefendorff, Power4 focuses on memory bandwidth: IBM confronts IA-64, says ISA not important, Microprocessor Report, vol. 13, Oct. 1999.
[6] D. M. Tullsen, S. J. Eggers, and H. M. Levy, Simultaneous multithreading: Maximizing onchip parallelism, in Proceedings of the nd Annual International Symposium on Computer Architecture, pp. 392403, ACM Press, June 2224 1995. [7] J. L. Lo, J. S. Emer, H. M. Levy, R. L. Stamm, and D. M. Tullsen, Converting thread-level parallelism to instruction-level parallelism via simultaneous multithreading, ACM Transactions on Computer Systems, vol. 15, pp. 322354, Aug. 1997. [8] D. M. Tullsen, S. J. Eggers, J. S. Emer, H. M. Levy, J. L. Lo, and R. L. Stamm, Exploiting choice : Instruction fetch and issue on an implementable simultaneous MultiThreading processor, in Proceedings of the rd Annual International Symposium on Computer Architecure, (New York), pp. 191202, ACM Press, May 2224 1996. [9] K. Diefendorff, Compaq chooses SMT for alpha, Microprocessor Report, vol. 13, Dec. 1999. [10] J. Petrovick, POWER4 chip integration, in Hot Chips 12: Stanford University, Stanford, California, August 1315, 2000 (IEEE, ed.), (1109 Spring Street, Suite 300, Silver Spring, MD 20910, USA), IEEE Computer Society Press, 2000. [11] S. Palacharla, N. P. Jouppi, and J. E. Smith, Complexity-effective superscalar processors, in th Annual International Symposium on Computer Architecture, pp. 206218, 1997. [12] R. E. Kessler, The Alpha 21264 microprocessor: Out-of-order execution at 600 MHz, in Hot chips 10: conference record: August 1618, 1998, Memorial Auditorium, Stanford University, Palo Alto, California (IEEE, ed.), (1109 Spring Street, Suite 300, Silver Spring, MD 20910, USA), IEEE Computer Society Press, 1998. [13] A. Seznec, S. Felix, V. Krishnan, and Y. Sazeid` s, Design tradeoffs for the ev8 branch predice th Annual International Symposium on Computer Architecture: tor, in Proceedings of the May 2529, 2002, Anchorage, Alaska, (New York, NY, USA), ACM Press, 2002. [14] S. Hily and A. Seznec, Branch prediction and simultaneous multithreading, in Proceedings of the 1996 Conference on Parallel Architectures and Compilation Techniques (PACT 96), (Boston, Massachusetts), pp. 169173, IEEE Computer Society Press, Oct. 2023, 1996. [15] R. L. Sites, Alpha Architecture Reference Manual. Digital Press and Prentice-Hall, 1992. [16] E. Rotenberg, S. Bennett, and J. E. Smith, Trace cache: A low latency approach to high bandwidth instruction fetching, in Proceedings of the th Annual International Symposium on Microarchitecture, (Paris, France), pp. 2434, IEEE Computer Society TC-MICRO and ACM SIGMICRO, Dec. 24, 1996. [17] A. Seznec and P. Michaud, De-aliased hybrid branch predictors, Technical Report RR-3618, Inria, Institut National de Recherche en Informatique et en Automatique, 1999. [18] D. L. Weaver and T. Germond, eds., The SPARC Architecture Manual, version 9. PTR Prenttice Hall, 1994. [19] T. Lafage and A. Seznec, Combining light static code annotation and instruction-set emulation for exible and efcient on-the-y simulation, Technical Report PI-1285, IRISA, University of Rennes 1, 35042 Rennes, France, Dec. 1999. [20] E. Rohou, F. Bodin, and A. Seznec, S ALTO: System for assembly-language transformation and optimization, in Proceedings of the Sixth Workshop Compilers for Parallel Computers, Dec. 1996. [21] Y. Sazeides and T. Juan, How to compare the performance of two smt microarchitectures, in 2001 IEEE International Symposium on Performance Analysis of Systems and Software, 2001. [22] J. C. Mogul and A. Borg, The effect of context switches on cache performance, in Proceedings of the Sixth International Conference on Architectural Support for Programming Languages and Operating Systems, (Santa Clara, California), pp. 7585, 1991. [23] S. C. Woo, M. Ohara, E. Torrie, J. P. Singh, and A. Gupta, The SPLASH-2 programs: Characterization and methodological considerations, in Proc. of the nd Annual International Symposium on Computer Architecture, (Santa Margherita, Italy), pp. 2436, June 1995. Published as Proc. of the 22nd Annual International Symposium on Computer Architecture (22nd ISCA95), ACM SIGARCH Computer Architecture News, volume 23, number 6.
&
Documents Similar To Cash L2 Prosesor
Edwin Varghese
Venkatesh Angulyabharanam
misterio169
The Effective Way of Processor Performance Enhancement by Proper Branch Handling
Gecco09 Coarse Grain on of Evolutionary Algorithms On
A Fine-Grained, Dynamic Load Distribution Model for Parallel Stream Processing
Final Mpsoc
Ch05 The memory system.ppt
Sanchit Rai
Dpdk Packet Processing Ia Overview Presentation
Hassan Wilo
kelsey grant nur4948l
Usc Freshman Profile 2012
lampdresser
Florida Mason & Masonic Lifestyle 2011 Vol 4 Iss 1
rose lesson 1 math nonnumeric patterns
REINSTILLATION OF MORAL AND ETHICAL VALUES IN CHILDREN AND YOUTH: REFLECTING UPON THE ROLE OF PRECEPTORS AND PARENTS IN REKINDLING THE FLAME OF MORALITY IN MORTALSWITH SPECIAL REFERENCE TO INDIAN EDUCATION SYSTEM
ClydeReyes
1 How Concepts Are Acquired
Gowri Nagamah
Ensino de Geociências
paumen10
education - resume
api-341985891
formatthesis-130707012327-phpapp01
8263623 Modularity of Mind Jerry a Fodor
Ethnic Identity and Self Esteem: A Case Study With Turkish Cypriots - Nweke Elochukwu Gabriel
BCI Achieves Gold Partnership Status with Oracle Corporation
0711 GPON System

value: This website is an American e-book and audiobook subscription service that includes one million titles.