Here at Metamarkets we have developed a web-based analytics console that supports drill-downs and roll-ups of high dimensional data sets – comprising billions of events – in real-time. This is the first of two blog posts introducing Druid, the data store that powers our console. Over the last twelve months, we tried and failed to achieve scale and speed with relational databases (Greenplum, InfoBright, MySQL) and NoSQL offerings (HBase). So instead we did something crazy: we rolled our own database. Druid is the distributed, in-memory OLAP data store that resulted.
The Challenge: Fast Roll-Ups Over Big Data
To frame our discussion, let’s begin with an illustration of what our raw impression event logs look like, containing many dimensions and two metrics (click and price).
timestamp publisher advertiser gender country .. dimensions .. click price 2011-01-01T01:01:35Z bieberfever.com google.com Male USA 0 0.65 2011-01-01T01:03:63Z bieberfever.com google.com Male USA 0 0.62 2011-01-01T01:04:51Z bieberfever.com google.com Male USA 1 0.45 ... 2011-01-01T01:00:00Z ultratrimfast.com google.com Female UK 0 0.87 2011-01-01T02:00:00Z ultratrimfast.com google.com Female UK 0 0.99 2011-01-01T02:00:00Z ultratrimfast.com google.com Female UK 1 1.53 ...
We call this our alpha data set. We perform a first-level aggregation operation over a selected set of dimensions, equivalent to (in pseudocode):
GROUP BY timestamp, publisher, advertiser, gender, country :: impressions = COUNT(1), clicks = SUM(click), revenue = SUM(price)
to yield a compacted version:
timestamp publisher advertiser gender country impressions clicks revenue 2011-01-01T01:00:00Z ultratrimfast.com google.com Male USA 1800 25 15.70 2011-01-01T01:00:00Z bieberfever.com google.com Male USA 2912 42 29.18 2011-01-01T02:00:00Z ultratrimfast.com google.com Male UK 1953 17 17.31 2011-01-01T02:00:00Z bieberfever.com google.com Male UK 3194 170 34.01
This is our beta data set, filtered for five selected dimensions and compacted. In the limit, as we group by all available dimensions, the size of this aggregated beta converges to the original alpha . In practice, it is dramatically smaller (often by a factor of 100). Our beta data comprises three distinct parts:
Timestamp column: We treat timestamp separately because all of our queries center around the time axis. Timestamps are faceted by varying granularities (hourly, in the example above).
Dimension columns: Here we have four dimensions of publisher, advertiser, gender, and country. They each represent an axis of the data that we’ve chosen to slice across.
Metric columns: These are impressions, clicks and revenue. These represent values, usually numeric, which are derived from an aggregation operation – such as count, sum, and mean (we also run variance and higher moment calculations). For example, in the first row, the revenue metric of 15.70 is the sum of 1800 event-level prices.
Our goal is to rapidly compute drill-downs and roll-ups over this data set. We want to answer questions like “How many impressions from males were on bieberfever.com?” and “What is the average cost to advertise to women at ultratrimfast.com?” But we have a hard requirement to meet: we want queries over any arbitrary combination of dimensions at sub-second latencies.
Performance of such a system is dependent on the size of our beta set, and there are two ways that this becomes large: (i) when we include additional dimensions, and (ii) when we include a dimension whose cardinality is large. Using our example, for every hour’s worth of data we calculate the maximum number of rows as:
number_of_publishers * number_of_advertisers * number_of_genders * number of countries
If we have 10 publishers, 50 advertisers, 2 genders, and 120 countries, that would yield a maximum of 120,000 rows. If there had been 1,000,000 possible publishers, it would become a maximum of 12 billion rows. If we add 10 more dimensions of cardinality 10, then it becomes a maximum of 1.2 quadrillion (1.2 x 10^15) rows.
Luckily for us, these data sets are generally sparse, as dimension values are not conditionally independent (few Kazakhstanis visit beiberfever.com, for example). Thus the combinatorial explosion is far less than the theoretical worst-case. Nonetheless, as a rule, more dimensions and more cardinality dramatically inflate the size of the data set.
Failed Solution I: Dynamic Roll-Ups with a RDBMS
Our stated goals of aggregation and drill-down are well suited to a classical relational architecture. So about a year ago, we fired up a RDBMS instance (actually, the Greenplum Community Edition, running on an m1.large EC2 box), and began loading our data into it. It worked and we were able to build the initial version of our console on this system. However, we had two problems:
- We stored the data in a star schema, which meant that there was operational overhead maintaining dimension and fact tables.
- Whenever we needed to do a full table scan, for things like global counts, the queries ran slow. For example, naive benchmarks showed scanning 33 million rows took 3 seconds.
We initially just decided to eat the operational overhead of (1) because that’s how these systems work and we benefited from having the database to do our storage and computation. But, (2) was painful. We started materializing all dimensional roll-ups of a certain depth, and began routing queries to these pre-aggregated tables. We also implemented a caching layer in front of our queries.
This approach generally worked and is, I believe, a fairly common strategy in the space. Except, when things weren’t in the cache and a query couldn’t be mapped to a pre-aggregated table, we were back to full scans and slow performance. We tried indexing our way out of it, but given that we are allowing arbitrary combinations of dimensions, we couldn’t really take advantage of composite indexes. Additionally, index merge strategies are not always implemented, or only implemented for bitmap indexes, depending on the flavor of RDBMS.
We also benchmarked plain Postgres, MySQL, and InfoBright, but did not observe dramatically better performance. Seeing no path ahead for our relational database, we turned to one of those new-fangled, massively scalable NOSQL solutions.
Failed Solution II: Pre-compute the World in NoSQL
We used a data storage schema very similar to Twitter’s Rainbird.
In short, we took all of our data and pre-computed aggregates for every combination of dimensions. At query time we need only locate the specific pre-computed aggregate and and return it: an O(1) key-value lookup. This made things fast and worked wonderfully when we had a six dimension beta data set. But when we added five more dimensions – giving us 11 dimensions total – the time to pre-compute all aggregates became unmanageably large (such that we never waited more than 24 hours required to see it finish).
So we decided to limit the depth that we aggregated to. By only pre-computing aggregates of five dimensions or less, we were able to limit some of the exponential expansion of the data. The data became manageable again, meaning it only took about 4 hours on 15 machines to compute the expansion of a 500k beta rows into the full multi-billion entry output data set.
Then we added three more dimensions, bringing us up to 14. This turned into 9 hours on 25 machines. We realized that we were doing it wrong.
Lesson learned: massively scalable counter systems like rainbird are intended for high cardinality data sets with pre-defined hierarchical drill-downs. But they break down when supporting arbitrary drill downs across all dimensions.
Introducing Druid: A Distributed, In-Memory OLAP Store
Stepping back from our two failures, let’s examine why these systems failed to scale for our needs:
- Relational Database Architectures
- Full table scans were slow, regardless of the storage engine used
- Maintaining proper dimension tables, indexes and aggregate tables was painful
- Parallelization of queries was not always supported or non-trivial
- Massive NOSQL With Pre-Computation
- Supporting high dimensional OLAP requires pre-computing an exponentially large amount of data
Looking at the problems with these solutions, it looks like the first, RDBMS-style architecture has a simpler issue to tackle: namely, how to scan tables fast? When we were looking at our 500k row data set, someone remarked, “Dude, I can store that in memory”. That was the answer.
Keeping everything in memory provides fast scans, but it does introduce a new problem: machine memory is limited. The corollary thus was: distribute the data over multiple machines. Thus, our requirements were:
- Ability to load up, store, and query data sets in memory
- Parallelized architecture that allows us to add more machines in order to relieve memory pressure
And then we threw in a couple more that seemed like good ideas:
- Parallelized queries to speed up full scan processing
- No dimensional tables to manage
These are the requirements we used to implement Druid. The system makes a number of simplifying assumptions that fit our use case (namely that all analytics are time-based) and integrates access to real-time and historical data for a configurable amount of time into the past.
The next installment will go into the architecture of Druid, how queries work and how the system can scale out to handle query hotspots and high cardinality data sets. For now, we leave you with a benchmark:
- Our 40-instance (m2.2xlarge) cluster can scan, filter, and aggregate 1 billion rows in 950 milliseconds.
Looking for more Druid information? Learn more about our core technology.
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